Quelle  Equivalence.thy

(*  Title:      JinjaDCI/J/Equivalence.thy
    Author:     Tobias Nipkow, Susannah Mansky
    Copyright   2003 Technische Universitaet Muenchen, 2019-20 UIUC

    Based on the Jinja theory J/Equivalence.thy by Tobias Nipkow
*)

section ‹ Equivalence of Big Step and Small Step Semantics ›

theory Equivalence imports TypeSafe WWellForm begin

subsection‹Small steps simulate big step›

subsubsection "Init"

text "The reduction of initialization expressions doesn't touch or use
 their on-hold expressions (the subexpression to the right of @{text ←})
 until the initialization operation completes. This function is used to prove
 this and related properties. It is then used for general reduction of
 initialization expressions separately from their on-hold expressions by
 using the on-hold expression @{term unit}, then putting the real on-hold
 expression back in at the end."

fun init_switch :: "'a exp ==> 'a exp ==> 'a exp" where
"init_switch (INIT C (Cs,b) ← e_i) e = (INIT C (Cs,b) ← e)" |
"init_switch (RI(C,e');Cs ← e_i) e = (RI(C,e');Cs ← e)" |
"init_switch e' e = e'"

fun INIT_class :: "'a exp ==> cname option" where
"INIT_class (INIT C (Cs,b) ← e) = (if C = last (C#Cs) then Some C else None)" |
"INIT_class (RI(C,e₀);Cs ← e) = Some (last (C#Cs))" |
"INIT_class _ = None"

lemma init_red_init:
"[ init_exp_of e₀ = ⌊e⌋; P ⊨ ⟨e₀,s₀,b₀⟩ → ⟨e₁,s₁,b₁⟩ ]
  ==> (init_exp_of e₁ = ⌊e⌋ ∧ (INIT_class e₀ = ⌊C⌋ ⟶ INIT_class e₁ = ⌊C⌋))
   ∨ (e₁ = e ∧ b₁ = icheck P (the(INIT_class e₀)) e) ∨ (∃a. e₁ = throw a)"
 by(erule red.cases, auto)

lemma init_exp_switch[simp]:
"init_exp_of e₀ = ⌊e⌋ ==> init_exp_of (init_switch e₀ e') = ⌊e'⌋"
 by(cases e₀, simp_all)

lemma init_red_sync:
"[ P ⊨ ⟨e₀,s₀,b₀⟩ → ⟨e₁,s₁,b₁⟩; init_exp_of e₀ = ⌊e⌋; e₁ ≠ e ]
  ==> (∧e'. P ⊨ ⟨init_switch e₀ e',s₀,b₀⟩ → ⟨init_switch e₁ e',s₁,b₁⟩)"
proof(induct rule: red.cases) qed(simp_all add: red_reds.intros)

lemma init_red_sync_end:
"[ P ⊨ ⟨e₀,s₀,b₀⟩ → ⟨e₁,s₁,b₁⟩; init_exp_of e₀ = ⌊e⌋; e₁ = e; throw_of e = None ]
  ==> (∧e'. ¬sub_RI e' ==> P ⊨ ⟨init_switch e₀ e',s₀,b₀⟩ → ⟨e',s₁,icheck P (the(INIT_class e₀)) e'⟩)"
proof(induct rule: red.cases) qed(simp_all add: red_reds.intros)

lemma init_reds_sync_unit':
 "[ P ⊨ ⟨e₀,s₀,b₀⟩ →* ⟨Val v',s₁,b₁⟩; init_exp_of e₀ = ⌊unit⌋; INIT_class e₀ = ⌊C⌋ ]
  ==> (∧e'. ¬sub_RI e' ==> P ⊨ ⟨init_switch e₀ e',s₀,b₀⟩ →* ⟨e',s₁,icheck P (the(INIT_class e₀)) e'⟩)"
proof(induct rule:converse_rtrancl_induct3)
case refl then show ?case by simp
next
  case (step e0 s0 b0 e1 s1 b1)
  have "(init_exp_of e1 = ⌊unit⌋ ∧ (INIT_class e0 = ⌊C⌋ ⟶ INIT_class e1 = ⌊C⌋))
          ∨ (e1 = unit ∧ b1 = icheck P (the(INIT_class e0)) unit) ∨ (∃a. e1 = throw a)"
    using init_red_init[OF step.prems(1) step.hyps(1)] by simp
  then show ?case
  proof(rule disjE)
    assume assm: "init_exp_of e1 = ⌊unit⌋ ∧ (INIT_class e0 = ⌊C⌋ ⟶ INIT_class e1 = ⌊C⌋)"
    then have red: "P ⊨ ⟨init_switch e0 e',s0,b0⟩ → ⟨init_switch e1 e',s1,b1⟩"
      using init_red_sync[OF step.hyps(1) step.prems(1)] by simp
    have reds: "P ⊨ ⟨init_switch e1 e',s1,b1⟩ →* ⟨e',s₁,icheck P (the (INIT_class e0)) e'⟩"
      using step.hyps(3)[OF _ _ step.prems(3)] assm step.prems(2) by simp
    show ?thesis by(rule converse_rtrancl_into_rtrancl[OF red reds])
  next
    assume "(e1 = unit ∧ b1 = icheck P (the(INIT_class e0)) unit) ∨ (∃a. e1 = throw a)"
    then show ?thesis
    proof(rule disjE)
      assume assm: "e1 = unit ∧ b1 = icheck P (the(INIT_class e0)) unit" then have e1: "e1 = unit" by simp
      have sb: "s1 = s₁" "b1 = b₁" using reds_final_same[OF step.hyps(2)] assm
        by(simp_all add: final_def)
      then have step': "P ⊨ ⟨init_switch e0 e',s0,b0⟩ → ⟨e',s₁,icheck P (the (INIT_class e0)) e'⟩"
        using init_red_sync_end[OF step.hyps(1) step.prems(1) e1 _ step.prems(3)] by auto
      then have "P ⊨ ⟨init_switch e0 e',s0,b0⟩ →* ⟨e',s₁,icheck P (the (INIT_class e0)) e'⟩"
        using r_into_rtrancl by auto
      then show ?thesis using step assm sb by simp
    next
      assume "∃a. e1 = throw a" then obtain a where "e1 = throw a" by clarsimp
      then have tof: "throw_of e1 = ⌊a⌋" by simp
      then show ?thesis using reds_throw[OF step.hyps(2) tof] by simp
    qed
  qed
qed

lemma init_reds_sync_unit_throw':
 "[ P ⊨ ⟨e₀,s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩; init_exp_of e₀ = ⌊unit⌋ ]
  ==> (∧e'. P ⊨ ⟨init_switch e₀ e',s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩)"
proof(induct rule:converse_rtrancl_induct3)
case refl then show ?case by simp
next
  case (step e0 s0 b0 e1 s1 b1)
  have "init_exp_of e1 = ⌊unit⌋ ∧ (∀C. INIT_class e0 = ⌊C⌋ ⟶ INIT_class e1 = ⌊C⌋) ∨
  e1 = unit ∧ b1 = icheck P (the (INIT_class e0)) unit ∨ (∃a. e1 = throw a)"
    using init_red_init[OF step.prems(1) step.hyps(1)] by auto
  then show ?case
  proof(rule disjE)
    assume assm: "init_exp_of e1 = ⌊unit⌋ ∧ (∀C. INIT_class e0 = ⌊C⌋ ⟶ INIT_class e1 = ⌊C⌋)"
    then have "P ⊨ ⟨init_switch e0 e',s0,b0⟩ → ⟨init_switch e1 e',s1,b1⟩"
      using step init_red_sync[OF step.hyps(1) step.prems] by simp
    then show ?thesis using step assm by (meson converse_rtrancl_into_rtrancl)
  next
    assume "e1 = unit ∧ b1 = icheck P (the (INIT_class e0)) unit ∨ (∃a. e1 = throw a)"
    then show ?thesis
    proof(rule disjE)
      assume "e1 = unit ∧ b1 = icheck P (the (INIT_class e0)) unit"
      then show ?thesis using step using final_def reds_final_same by blast
    next
      assume assm: "∃a. e1 = throw a"
      then have "P ⊨ ⟨init_switch e0 e',s0,b0⟩ → ⟨e1,s1,b1⟩"
        using init_red_sync[OF step.hyps(1) step.prems] by clarsimp
      then show ?thesis using step by simp
    qed
  qed
qed

lemma init_reds_sync_unit:
assumes "P ⊨ ⟨e₀,s₀,b₀⟩ →* ⟨Val v',s₁,b₁⟩" and "init_exp_of e₀ = ⌊unit⌋" and "INIT_class e₀ = ⌊C⌋"
  and "¬sub_RI e'"
shows "P ⊨ ⟨init_switch e₀ e',s₀,b₀⟩ →* ⟨e',s₁,icheck P (the(INIT_class e₀)) e'⟩"
using init_reds_sync_unit'[OF assms] by clarsimp

lemma init_reds_sync_unit_throw:
assumes "P ⊨ ⟨e₀,s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩" and "init_exp_of e₀ = ⌊unit⌋"
shows "P ⊨ ⟨init_switch e₀ e',s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩"
using init_reds_sync_unit_throw'[OF assms] by clarsimp

― ‹ init reds lemmas ›

lemma InitSeqReds:
assumes "P ⊨ ⟨INIT C ([C],b) ← unit,s₀,b₀⟩ →* ⟨Val v',s₁,b₁⟩"
 and "P ⊨ ⟨e,s₁,icheck P C e⟩ →* ⟨e₂,s₂,b₂⟩" and "¬sub_RI e"
shows "P ⊨ ⟨INIT C ([C],b) ← e,s₀,b₀⟩ →* ⟨e₂,s₂,b₂⟩"
using assms
proof -
  have "P ⊨ ⟨init_switch (INIT C ([C],b) ← unit) e,s₀,b₀⟩ →* ⟨e,s₁,icheck P C e⟩"
    using init_reds_sync_unit[OF assms(1) _ _ assms(3)] by simp
  then show ?thesis using assms(2) by simp
qed

lemma InitSeqThrowReds:
assumes "P ⊨ ⟨INIT C ([C],b) ← unit,s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩"
shows "P ⊨ ⟨INIT C ([C],b) ← e,s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩"
using assms
proof -
  have "P ⊨ ⟨init_switch (INIT C ([C],b) ← unit) e,s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩"
    using init_reds_sync_unit_throw[OF assms(1)] by simp
  then show ?thesis by simp
qed

lemma InitNoneReds:
 "[ sh C = None;
    P ⊨ ⟨INIT C' (C # Cs,False) ← e,(h, l, sh(C ↦ (sblank P C, Prepared))),b⟩ →* ⟨e',s',b'⟩ ]
\<Longrightarrow> P ⊨ ⟨INIT C' (C#Cs,False) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩"
(*<*)by(rule InitNoneRed[THEN converse_rtrancl_into_rtrancl])(*>*)

lemma InitDoneReds:
 "[ sh C = Some(sfs,Done); P ⊨ ⟨INIT C' (Cs,True) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩ ]
\<Longrightarrow> P ⊨ ⟨INIT C' (C#Cs,False) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩"
(*<*)by(rule RedInitDone[THEN converse_rtrancl_into_rtrancl])(*>*)

lemma InitProcessingReds:
 "[ sh C = Some(sfs,Processing); P ⊨ ⟨INIT C' (Cs,True) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩ ]
\<Longrightarrow> P ⊨ ⟨INIT C' (C#Cs,False) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩"
(*<*)by(rule RedInitProcessing[THEN converse_rtrancl_into_rtrancl])(*>*)

lemma InitErrorReds:
 "[ sh C = Some(sfs,Error); P ⊨ ⟨RI (C,THROW NoClassDefFoundError);Cs ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩ ]
\<Longrightarrow> P ⊨ ⟨INIT C' (C#Cs,False) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩"
(*<*)by(rule RedInitError[THEN converse_rtrancl_into_rtrancl])(*>*)

lemma InitObjectReds:
 "[ sh C = Some(sfs,Prepared); C = Object; sh' = sh(C ↦ (sfs,Processing));
    P ⊨ ⟨INIT C' (C#Cs,True) ← e,(h,l,sh'),b⟩ →* ⟨e',s',b'⟩ ]
\<Longrightarrow> P ⊨ ⟨INIT C' (C#Cs,False) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩"
(*<*)by(rule InitObjectRed[THEN converse_rtrancl_into_rtrancl])(*>*)

lemma InitNonObjectReds:
 "[ sh C = Some(sfs,Prepared); C ≠ Object; class P C = Some (D,r);
    sh' = sh(C ↦ (sfs,Processing));
    P ⊨ ⟨INIT C' (D#C#Cs,False) ← e,(h,l,sh'),b⟩ →* ⟨e',s',b'⟩ ]
\<Longrightarrow> P ⊨ ⟨INIT C' (C#Cs,False) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩"
(*<*)by(rule InitNonObjectSuperRed[THEN converse_rtrancl_into_rtrancl])(*>*)

lemma RedsInitRInit:
 "P ⊨ ⟨RI (C,C∙_sclinit([]));Cs ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩
\<Longrightarrow> P ⊨ ⟨INIT C' (C#Cs,True) ← e,(h,l,sh),b⟩ →* ⟨e',s',b'⟩"
(*<*)by(rule RedInitRInit[THEN converse_rtrancl_into_rtrancl])(*>*)

lemmas rtrancl_induct3 =
  rtrancl_induct[of "(ax,ay,az)" "(bx,by,bz)", split_format (complete), consumes 1, case_names refl step]

lemma RInitReds:
 "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩
\<Longrightarrow> P ⊨ ⟨RI (C,e);Cs ← e₀, s, b⟩ →* ⟨RI (C,e');Cs ← e₀, s', b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) RInitRed[OF step(2)]])
qed
(*>*)

lemma RedsRInit:
 "[ P ⊨ ⟨e₀,s₀,b₀⟩ →* ⟨Val v,(h₁,l₁,sh₁),b₁⟩;
    sh₁ C = Some (sfs, i); sh₂ = sh₁(C ↦ (sfs,Done)); C' = last(C#Cs);
    P ⊨ ⟨INIT C' (Cs,True) ← e,(h₁,l₁,sh₂),b₁⟩ →* ⟨e',s',b'⟩ ]
  ==> P ⊨ ⟨RI (C, e₀);Cs ← e,s₀,b₀⟩ →* ⟨e',s',b'⟩"
(*<*)
by(rule rtrancl_trans[OF RInitReds
                         RedRInit[THEN converse_rtrancl_into_rtrancl]])
(*>*)


lemma RInitInitThrowReds:
 "[ P ⊨ ⟨e,s,b⟩ →* ⟨Throw a,(h',l',sh'),b'⟩;
    sh' C = Some (sfs, i); sh'' = sh'(C ↦ (sfs,Error));
    P ⊨ ⟨RI (D,Throw a);Cs ← e₀, (h',l',sh''),b'⟩ →* ⟨e₁,s₁,b₁⟩ ]
  ==> P ⊨ ⟨RI (C, e);D#Cs ← e₀,s,b⟩ →* ⟨e₁,s₁,b₁⟩"
(*<*)
by(rule rtrancl_trans[OF RInitReds
                         RInitInitThrow[THEN converse_rtrancl_into_rtrancl]])
(*>*)

lemma RInitThrowReds:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨Throw a, (h',l',sh'),b'⟩;
     sh' C = Some(sfs, i); sh'' = sh'(C ↦ (sfs, Error)) ]
  ==> P ⊨ ⟨RI (C,e);Nil ← e₀,s,b⟩ →* ⟨Throw a, (h',l',sh''),b'⟩"
(*<*)by(rule RInitReds[THEN rtrancl_into_rtrancl, OF _ RInitThrow])(*>*)

subsubsection "New"

lemma NewInitDoneReds:
  "[ sh C = Some (sfs, Done); new_Addr h = Some a;
     P ⊨ C has_fields FDTs; h' = h(a↦blank P C) ]
   ==> P ⊨ ⟨new C,(h,l,sh),False⟩ →* ⟨addr a,(h',l,sh),False⟩"
(*<*)
by(rule NewInitDoneRed[THEN converse_rtrancl_into_rtrancl,
                       OF _ RedNew[THEN r_into_rtrancl]])
(*>*)

lemma NewInitDoneReds2:
  "[ sh C = Some (sfs, Done); new_Addr h = None; is_class P C ]
   ==> P ⊨ ⟨new C,(h,l,sh),False⟩ →* ⟨THROW OutOfMemory, (h,l,sh), False⟩"
(*<*)
by(rule NewInitDoneRed[THEN converse_rtrancl_into_rtrancl,
                       OF _ RedNewFail[THEN r_into_rtrancl]])
(*>*)

lemma NewInitReds:
assumes nDone: "∄sfs. shp s C = Some (sfs, Done)"
  and INIT_steps: "P ⊨ ⟨INIT C ([C],False) ← unit,s,False⟩ →* ⟨Val v',(h',l',sh'),b'⟩"
  and Addr: "new_Addr h' = Some a" and has: "P ⊨ C has_fields FDTs"
  and h'': "h'' = h'(a↦blank P C)" and cls_C: "is_class P C"
shows "P ⊨ ⟨new C,s,False⟩ →* ⟨addr a,(h'',l',sh'),False⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  let ?b = "(INIT C ([C],False) ← new C,s,False)"
  let ?b' = "(new C,(h', l', sh'),icheck P C (new C::expr))"
  have b'c: "(?b', ?c) ∈ (red P)^*"
    using RedNew[OF Addr has h'', THEN r_into_rtrancl] by simp
  obtain h l sh where [simp]: "s = (h, l, sh)" by(cases s) simp
  have "(?a, ?b) ∈ (red P)^*"
    using NewInitRed[OF _ cls_C] nDone by fastforce
  also have "(?b, ?c) ∈ (red P)^*"
    by(rule InitSeqReds[OF INIT_steps b'c]) simp
  ultimately show ?thesis by simp
qed
(*>*)

lemma NewInitOOMReds:
assumes nDone: "∄sfs. shp s C = Some (sfs, Done)"
  and INIT_steps: "P ⊨ ⟨INIT C ([C],False) ← unit,s,False⟩ →* ⟨Val v',(h',l',sh'),b'⟩"
  and Addr: "new_Addr h' = None" and cls_C: "is_class P C"
shows "P ⊨ ⟨new C,s,False⟩ →* ⟨THROW OutOfMemory,(h',l',sh'),False⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  let ?b = "(INIT C ([C],False) ← new C,s,False)"
  let ?b' = "(new C,(h', l', sh'),icheck P C (new C::expr))"
  have b'c: "(?b', ?c) ∈ (red P)^*"
    using RedNewFail[OF Addr cls_C, THEN r_into_rtrancl] by simp
  obtain h l sh where [simp]: "s = (h, l, sh)" by(cases s) simp
  have "(?a, ?b) ∈ (red P)^*"
    using NewInitRed[OF _ cls_C] nDone by fastforce
  also have "(?b, ?c) ∈ (red P)^*"
    by(rule InitSeqReds[OF INIT_steps b'c]) simp
  ultimately show ?thesis by simp
qed
(*>*)

lemma NewInitThrowReds:
assumes nDone: "∄sfs. shp s C = Some (sfs, Done)"
  and cls_C: "is_class P C"
  and INIT_steps: "P ⊨ ⟨INIT C ([C],False) ← unit,s,False⟩ →* ⟨throw a,s',b'⟩"
shows "P ⊨ ⟨new C,s,False⟩ →* ⟨throw a,s',b'⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  let ?b = "(INIT C ([C],False) ← new C,s,False)"
  obtain h l sh where [simp]: "s = (h, l, sh)" by(cases s) simp
  have "(?a, ?b) ∈ (red P)^*"
    using NewInitRed[OF _ cls_C] nDone by fastforce
  also have "(?b, ?c) ∈ (red P)^*"
    using InitSeqThrowReds[OF INIT_steps] by simp
  ultimately show ?thesis by simp
qed
(*>*)

subsubsection "Cast"

lemma CastReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨Cast C e,s,b⟩ →* ⟨Cast C e',s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) CastRed[OF step(2)]])
qed
(*>*)

lemma CastRedsNull:
  "P ⊨ ⟨e,s,b⟩ →* ⟨null,s',b'⟩ ==> P ⊨ ⟨Cast C e,s,b⟩ →* ⟨null,s',b'⟩"
(*<*)by(rule CastReds[THEN rtrancl_into_rtrancl, OF _ RedCastNull])(*>*)

lemma CastRedsAddr:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨addr a,s',b'⟩; hp s' a = Some(D,fs); P ⊨ D ⪯^* C ] ==>
  P ⊨ ⟨Cast C e,s,b⟩ →* ⟨addr a,s',b'⟩"
(*<*)by(cases s', simp) (rule CastReds[THEN rtrancl_into_rtrancl, OF _ RedCast])(*>*)

lemma CastRedsFail:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨addr a,s',b'⟩; hp s' a = Some(D,fs); ¬ P ⊨ D ⪯^* C ] ==>
  P ⊨ ⟨Cast C e,s,b⟩ →* ⟨THROW ClassCast,s',b'⟩"
(*<*)by(cases s', simp) (rule CastReds[THEN rtrancl_into_rtrancl, OF _ RedCastFail])(*>*)

lemma CastRedsThrow:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨throw a,s',b'⟩ ] ==> P ⊨ ⟨Cast C e,s,b⟩ →* ⟨throw a,s',b'⟩"
(*<*)by(rule CastReds[THEN rtrancl_into_rtrancl, OF _ red_reds.CastThrow])(*>*)

subsubsection "LAss"

lemma LAssReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨ V:=e,s,b⟩ →* ⟨ V:=e',s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) LAssRed[OF step(2)]])
qed
(*>*)

lemma LAssRedsVal:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨Val v,(h',l',sh'),b'⟩ ] ==> P ⊨ ⟨ V:=e,s,b⟩ →* ⟨unit,(h',l'(V↦v),sh'),b'⟩"
(*<*)by(rule LAssReds[THEN rtrancl_into_rtrancl, OF _ RedLAss])(*>*)

lemma LAssRedsThrow:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨throw a,s',b'⟩ ] ==> P ⊨ ⟨ V:=e,s,b⟩ →* ⟨throw a,s',b'⟩"
(*<*)by(rule LAssReds[THEN rtrancl_into_rtrancl, OF _ red_reds.LAssThrow])(*>*)

subsubsection "BinOp"

lemma BinOp1Reds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨ e «bop¬ e₂, s,b⟩ →* ⟨e' «bop¬ e₂, s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) BinOpRed1[OF step(2)]])
qed
(*>*)

lemma BinOp2Reds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨(Val v) «bop¬ e, s,b⟩ →* ⟨(Val v) «bop¬ e', s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) BinOpRed2[OF step(2)]])
qed
(*>*)

lemma BinOpRedsVal:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨Val v₁,s₁,b₁⟩"
  and e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨Val v₂,s₂,b₂⟩"
  and op: "binop(bop,v₁,v₂) = Some v"
shows "P ⊨ ⟨e₁ «bop¬ e₂, s₀,b₀⟩ →* ⟨Val v,s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(Val v₁ «bop¬ e₂, s₁,b₁)"
  let ?y' = "(Val v₁ «bop¬ Val v₂, s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule BinOp1Reds[OF e₁_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule BinOp2Reds[OF e₂_steps])
  also have "(?y', ?z) ∈ (red P)" by(rule RedBinOp[OF op])
  ultimately show ?thesis by simp
qed
(*>*)

lemma BinOpRedsThrow1:
  "P ⊨ ⟨e,s,b⟩ →* ⟨throw e',s',b'⟩ ==> P ⊨ ⟨e «bop¬ e₂, s,b⟩ →* ⟨throw e', s',b'⟩"
(*<*)by(rule BinOp1Reds[THEN rtrancl_into_rtrancl, OF _ red_reds.BinOpThrow1])(*>*)

lemma BinOpRedsThrow2:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨Val v₁,s₁,b₁⟩"
  and e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨throw e,s₂,b₂⟩"
shows "P ⊨ ⟨e₁ «bop¬ e₂, s₀,b₀⟩ →* ⟨throw e,s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(Val v₁ «bop¬ e₂, s₁,b₁)"
  let ?y' = "(Val v₁ «bop¬ throw e, s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule BinOp1Reds[OF e₁_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule BinOp2Reds[OF e₂_steps])
  also have "(?y', ?z) ∈ (red P)" by(rule red_reds.BinOpThrow2)
  ultimately show ?thesis by simp
qed
(*>*)

subsubsection "FAcc"

lemma FAccReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨e∙F{D}, s,b⟩ →* ⟨e'∙F{D}, s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) FAccRed[OF step(2)]])
qed
(*>*)

lemma FAccRedsVal:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨addr a,s',b'⟩; hp s' a = Some(C,fs); fs(F,D) = Some v;
    P ⊨ C has F,NonStatic:t in D ]
  ==> P ⊨ ⟨e∙F{D},s,b⟩ →* ⟨Val v,s',b'⟩"
(*<*)by(cases s',simp) (rule FAccReds[THEN rtrancl_into_rtrancl, OF _ RedFAcc])(*>*)

lemma FAccRedsNull:
  "P ⊨ ⟨e,s,b⟩ →* ⟨null,s',b'⟩ ==> P ⊨ ⟨e∙F{D},s,b⟩ →* ⟨THROW NullPointer,s',b'⟩"
(*<*)by(rule FAccReds[THEN rtrancl_into_rtrancl, OF _ RedFAccNull])(*>*)

lemma FAccRedsNone:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨addr a,s',b'⟩;
     hp s' a = Some(C,fs);
    ¬(∃b t. P ⊨ C has F,b:t in D) ]
  ==> P ⊨ ⟨e∙F{D},s,b⟩ →* ⟨THROW NoSuchFieldError,s',b'⟩"
(*<*)by(cases s',simp) (auto intro: FAccReds[THEN rtrancl_into_rtrancl, OF _ RedFAccNone])(*>*)

lemma FAccRedsStatic:
  "[ P ⊨ ⟨e,s,b⟩ →* ⟨addr a,s',b'⟩;
     hp s' a = Some(C,fs);
    P ⊨ C has F,Static:t in D ]
  ==> P ⊨ ⟨e∙F{D},s,b⟩ →* ⟨THROW IncompatibleClassChangeError,s',b'⟩"
(*<*)by(cases s',simp) (rule FAccReds[THEN rtrancl_into_rtrancl, OF _ RedFAccStatic])(*>*)

lemma FAccRedsThrow:
  "P ⊨ ⟨e,s,b⟩ →* ⟨throw a,s',b'⟩ ==> P ⊨ ⟨e∙F{D},s,b⟩ →* ⟨throw a,s',b'⟩"
(*<*)by(rule FAccReds[THEN rtrancl_into_rtrancl, OF _ red_reds.FAccThrow])(*>*)

subsubsection "SFAcc"

lemma SFAccReds:
  "[ P ⊨ C has F,Static:t in D;
     shp s D = Some(sfs,Done); sfs F = Some v ]
  ==> P ⊨ ⟨C∙_sF{D},s,True⟩ →* ⟨Val v,s,False⟩"
(*<*)by(cases s,simp) (rule RedSFAcc[THEN r_into_rtrancl])(*>*)

lemma SFAccRedsNone:
  "¬(∃b t. P ⊨ C has F,b:t in D)
  ==> P ⊨ ⟨C∙_sF{D},s,b⟩ →* ⟨THROW NoSuchFieldError,s,False⟩"
(*<*)by(cases s,simp) (auto intro: RedSFAccNone[THEN r_into_rtrancl])(*>*)

lemma SFAccRedsNonStatic:
  "P ⊨ C has F,NonStatic:t in D
  ==> P ⊨ ⟨C∙_sF{D},s,b⟩ →* ⟨THROW IncompatibleClassChangeError,s,False⟩"
(*<*)by(cases s,simp) (rule RedSFAccNonStatic[THEN r_into_rtrancl])(*>*)

lemma SFAccInitDoneReds:
assumes cF: "P ⊨ C has F,Static:t in D"
  and shp: "shp s D = Some (sfs,Done)" and sfs: "sfs F = Some v"
shows "P ⊨ ⟨C∙_sF{D}, s, b⟩ →* ⟨Val v, s, False⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  obtain h l sh where [simp]: "s = (h, l, sh)" by(cases s) simp
  show ?thesis proof(cases b)
    case True
    then show ?thesis using assms
      by simp (rule RedSFAcc[THEN r_into_rtrancl])
  next
    case False
    let ?b = "(C∙_sF{D},s,True)"
    have "(?a, ?b) ∈ (red P)^*"
      using False SFAccInitDoneRed[where sh="shp s", OF cF shp] by fastforce
    also have "(?b, ?c) ∈ (red P)^*" by(rule SFAccReds[OF assms])
    ultimately show ?thesis by simp
  qed
qed
(*>*)

lemma SFAccInitReds:
assumes cF: "P ⊨ C has F,Static:t in D"
  and nDone: "∄sfs. shp s D = Some (sfs,Done)"
  and INIT_steps: "P ⊨ ⟨INIT D ([D],False) ← unit,s,False⟩ →* ⟨Val v',s',b'⟩"
  and shp': "shp s' D = Some (sfs,i)" and sfs: "sfs F = Some v"
shows "P ⊨ ⟨C∙_sF{D},s,False⟩ →* ⟨Val v,s',False⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  let ?b = "(INIT D ([D],False) ← C∙_sF{D},s,False)"
  let ?b' = "(C∙_sF{D},s',icheck P D (C∙_sF{D}::expr))"
  obtain h l sh where [simp]: "s = (h, l, sh)" by(cases s) simp
  obtain h' l' sh' where [simp]: "s' = (h', l', sh')" by(cases s') simp
  have icheck: "icheck P D (C∙_sF{D}) = True" using cF by fastforce
  then have b'c: "(?b', ?c) ∈ (red P)^*"
    using RedSFAcc[THEN r_into_rtrancl, OF cF] shp' sfs by simp
  have "(?a, ?b) ∈ (red P)" using SFAccInitRed[OF cF] nDone by simp
  also have "(?b, ?c) ∈ (red P)^*"
    by(rule InitSeqReds[OF INIT_steps b'c]) simp
  ultimately show ?thesis by simp
qed
(*>*)

lemma SFAccInitThrowReds:
  "[ P ⊨ C has F,Static:t in D;
     ∄sfs. shp s D = Some (sfs,Done);
     P ⊨ ⟨INIT D ([D],False) ← unit,s,False⟩ →* ⟨throw a,s',b'⟩ ]
 ==> P ⊨ ⟨C∙_sF{D},s,False⟩ →* ⟨throw a,s',b'⟩"
(*<*)
by(cases s, simp)
  (auto elim: converse_rtrancl_into_rtrancl[OF SFAccInitRed InitSeqThrowReds])
(*>*)

subsubsection "FAss"

lemma FAssReds1:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨e∙F{D}:=e₂, s,b⟩ →* ⟨e'∙F{D}:=e₂, s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) FAssRed1[OF step(2)]])
qed
(*>*)

lemma FAssReds2:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨Val v∙F{D}:=e, s,b⟩ →* ⟨Val v∙F{D}:=e', s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) FAssRed2[OF step(2)]])
qed
(*>*)

lemma FAssRedsVal:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨addr a,s₁,b₁⟩"
  and e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨Val v,(h₂,l₂,sh₂),b₂⟩"
  and cF: "P ⊨ C has F,NonStatic:t in D" and hC: "Some(C,fs) = h₂ a"
shows "P ⊨ ⟨e₁∙F{D}:=e₂, s₀, b₀⟩ →* ⟨unit, (h₂(a↦(C,fs((F,D)↦v))),l₂,sh₂),b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(addr a∙F{D}:=e₂, s₁, b₁)"
  let ?y' = "(addr a∙F{D}:=Val v::expr,(h₂,l₂,sh₂),b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule FAssReds1[OF e₁_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule FAssReds2[OF e₂_steps])
  also have "(?y', ?z) ∈ (red P)" using RedFAss[OF cF] hC by simp
  ultimately show ?thesis by simp
qed
(*>*)

lemma FAssRedsNull:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨null,s₁,b₁⟩"
  and e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨Val v,s₂,b₂⟩"
shows "P ⊨ ⟨e₁∙F{D}:=e₂, s₀, b₀⟩ →* ⟨THROW NullPointer, s₂, b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(null∙F{D}:=e₂, s₁, b₁)"
  let ?y' = "(null∙F{D}:=Val v::expr,s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule FAssReds1[OF e₁_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule FAssReds2[OF e₂_steps])
  also have "(?y', ?z) ∈ (red P)" by(rule RedFAssNull)
  ultimately show ?thesis by simp
qed
(*>*)

lemma FAssRedsThrow1:
  "P ⊨ ⟨e,s,b⟩ →* ⟨throw e',s',b'⟩ ==> P ⊨ ⟨e∙F{D}:=e₂, s,b⟩ →* ⟨throw e', s',b'⟩"
(*<*)by(rule FAssReds1[THEN rtrancl_into_rtrancl, OF _ red_reds.FAssThrow1])(*>*)

lemma FAssRedsThrow2:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨Val v,s₁,b₁⟩"
  and e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨throw e,s₂,b₂⟩"
shows "P ⊨ ⟨e₁∙F{D}:=e₂,s₀,b₀⟩ →* ⟨throw e,s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(Val v∙F{D}:=e₂,s₁,b₁)"
  let ?y' = "(Val v∙F{D}:=throw e,s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule FAssReds1[OF e₁_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule FAssReds2[OF e₂_steps])
  also have "(?y', ?z) ∈ (red P)" by(rule red_reds.FAssThrow2)
  ultimately show ?thesis by simp
qed
(*>*)

lemma FAssRedsNone:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨addr a,s₁,b₁⟩"
  and e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨Val v,(h₂,l₂,sh₂),b₂⟩"
  and hC: "h₂ a = Some(C,fs)" and ncF: "¬(∃b t. P ⊨ C has F,b:t in D)"
shows "P ⊨ ⟨e₁∙F{D}:=e₂, s₀, b₀⟩ →* ⟨THROW NoSuchFieldError, (h₂,l₂,sh₂), b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(addr a∙F{D}:=e₂, s₁, b₁)"
  let ?y' = "(addr a∙F{D}:=Val v::expr,(h₂,l₂,sh₂),b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule FAssReds1[OF e₁_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule FAssReds2[OF e₂_steps])
  also have "(?y', ?z) ∈ (red P)"
    using RedFAssNone[OF _ ncF] hC by simp
  ultimately show ?thesis by simp
qed
(*>*)

lemma FAssRedsStatic:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨addr a,s₁,b₁⟩"
  and e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨Val v,(h₂,l₂,sh₂),b₂⟩"
  and hC: "h₂ a = Some(C,fs)" and cF_Static: "P ⊨ C has F,Static:t in D"
shows "P ⊨ ⟨e₁∙F{D}:=e₂, s₀, b₀⟩ →* ⟨THROW IncompatibleClassChangeError, (h₂,l₂,sh₂), b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(addr a∙F{D}:=e₂, s₁, b₁)"
  let ?y' = "(addr a∙F{D}:=Val v::expr,(h₂,l₂,sh₂),b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule FAssReds1[OF e₁_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule FAssReds2[OF e₂_steps])
  also have "(?y', ?z) ∈ (red P)"
    using RedFAssStatic[OF _ cF_Static] hC by simp
  ultimately show ?thesis by simp
qed
(*>*)

subsubsection "SFAss"

lemma SFAssReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨C∙_sF{D}:=e,s,b⟩ →* ⟨C∙_sF{D}:=e',s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) SFAssRed[OF step(2)]])
qed
(*>*)

lemma SFAssRedsVal:
assumes e₂_steps: "P ⊨ ⟨e₂,s₀,b₀⟩ →* ⟨Val v,(h₂,l₂,sh₂),b₂⟩"
  and cF: "P ⊨ C has F,Static:t in D"
  and shD: "sh₂ D = ⌊(sfs,Done)⌋"
shows "P ⊨ ⟨C∙_sF{D}:=e₂, s₀, b₀⟩ →* ⟨unit, (h₂,l₂,sh₂(D↦(sfs(F↦v), Done))),False⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  let ?b = "(C∙_sF{D}:=Val v::expr, (h₂,l₂,sh₂), b₂)"
  have "(?a, ?b) ∈ (red P)^*" by(rule SFAssReds[OF e₂_steps])
  also have "(?b, ?c) ∈ (red P)^*" proof(cases b₂)
    case True
    then show ?thesis
      using RedSFAss[THEN r_into_rtrancl, OF cF] shD by simp
  next
    case False
    let ?b' = "(C∙_sF{D}:=Val v::expr, (h₂,l₂,sh₂), True)"
    have "(?b, ?b') ∈ (red P)^*"
      using False SFAssInitDoneRed[THEN converse_rtrancl_into_rtrancl, OF cF] shD
        by simp
    also have "(?b', ?c) ∈ (red P)^*"
      using RedSFAss[THEN r_into_rtrancl, OF cF] shD by simp
    ultimately show ?thesis by simp
  qed
  ultimately show ?thesis by simp
qed
(*>*)

lemma SFAssRedsThrow:
  "[ P ⊨ ⟨e₂,s₀,b₀⟩ →* ⟨throw e,s₂,b₂⟩ ]
  ==> P ⊨ ⟨C∙_sF{D}:=e₂,s₀,b₀⟩ →* ⟨throw e,s₂,b₂⟩"
(*<*)by(rule SFAssReds[THEN rtrancl_into_rtrancl, OF _ red_reds.SFAssThrow])(*>*)

lemma SFAssRedsNone:
  "[ P ⊨ ⟨e₂,s₀,b₀⟩ →* ⟨Val v,(h₂,l₂,sh₂),b₂⟩;
     ¬(∃b t. P ⊨ C has F,b:t in D) ] ==>
  P ⊨ ⟨C∙_sF{D}:=e₂,s₀,b₀⟩ →* ⟨THROW NoSuchFieldError, (h₂,l₂,sh₂),False⟩"
(*<*)by(rule SFAssReds[THEN rtrancl_into_rtrancl, OF _ RedSFAssNone])(*>*)

lemma SFAssRedsNonStatic:
  "[ P ⊨ ⟨e₂,s₀,b₀⟩ →* ⟨Val v,(h₂,l₂,sh₂),b₂⟩;
     P ⊨ C has F,NonStatic:t in D ] ==>
  P ⊨ ⟨C∙_sF{D}:=e₂,s₀,b₀⟩ →* ⟨THROW IncompatibleClassChangeError,(h₂,l₂,sh₂),False⟩"
(*<*)by(rule SFAssReds[THEN rtrancl_into_rtrancl, OF _ RedSFAssNonStatic])(*>*)

lemma SFAssInitReds:
assumes e₂_steps: "P ⊨ ⟨e₂,s₀,b₀⟩ →* ⟨Val v,(h₂,l₂,sh₂),False⟩"
  and cF: "P ⊨ C has F,Static:t in D"
  and nDone: "∄sfs. sh₂ D = Some (sfs, Done)"
  and INIT_steps: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₂,l₂,sh₂),False⟩ →* ⟨Val v',(h',l',sh'),b'⟩"
  and sh'D: "sh' D = Some(sfs,i)"
  and sfs': "sfs' = sfs(F↦v)" and sh'': "sh'' = sh'(D↦(sfs',i))"
shows "P ⊨ ⟨C∙_sF{D}:=e₂,s₀,b₀⟩ →* ⟨unit,(h',l',sh''),False⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(C∙_sF{D} := Val v::expr,(h₂, l₂, sh₂),False)"
  let ?y' = "(INIT D ([D],False) ← C∙_sF{D} := Val v::expr,(h₂, l₂, sh₂),False)"
  let ?y'' = "(C∙_sF{D} := Val v::expr,(h', l', sh'),icheck P D (C∙_sF{D} := Val v::expr))"
  have icheck: "icheck P D (C∙_sF{D} := Val v::expr)" using cF by fastforce
  then have y''z: "(?y'',?z) ∈ (red P)"
    using RedSFAss[OF cF _ sfs' sh''] sh'D by simp
  have "(?x, ?y) ∈ (red P)^*" by(rule SFAssReds[OF e₂_steps])
  also have "(?y, ?y') ∈ (red P)^*"
    using SFAssInitRed[THEN converse_rtrancl_into_rtrancl, OF cF] nDone
      by simp
  also have "(?y', ?z) ∈ (red P)^*"
    using InitSeqReds[OF INIT_steps y''z[THEN r_into_rtrancl]] by simp
  ultimately show ?thesis by simp
qed
(*>*)

lemma SFAssInitThrowReds:
assumes e₂_steps: "P ⊨ ⟨e₂,s₀,b₀⟩ →* ⟨Val v,(h₂,l₂,sh₂),False⟩"
  and cF: "P ⊨ C has F,Static:t in D"
  and nDone: "∄sfs. sh₂ D = Some (sfs, Done)"
  and INIT_steps: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₂,l₂,sh₂),False⟩ →* ⟨throw a,s',b'⟩"
shows "P ⊨ ⟨C∙_sF{D}:=e₂,s₀,b₀⟩ →* ⟨throw a,s',b'⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(C∙_sF{D} := Val v::expr,(h₂, l₂, sh₂),False)"
  let ?y' = "(INIT D ([D],False) ← C∙_sF{D} := Val v::expr,(h₂, l₂, sh₂),False)"
  have "(?x, ?y) ∈ (red P)^*" by(rule SFAssReds[OF e₂_steps])
  also have "(?y, ?y') ∈ (red P)^*"
    using SFAssInitRed[THEN converse_rtrancl_into_rtrancl, OF cF] nDone
      by simp
  also have "(?y', ?z) ∈ (red P)^*"
    using InitSeqThrowReds[OF INIT_steps] by simp
  ultimately show ?thesis by simp
qed
(*>*)

subsubsection";;"

lemma  SeqReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨e;;e₂, s,b⟩ →* ⟨e';;e₂, s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) SeqRed[OF step(2)]])
qed
(*>*)

lemma SeqRedsThrow:
  "P ⊨ ⟨e,s,b⟩ →* ⟨throw e',s',b'⟩ ==> P ⊨ ⟨e;;e₂, s,b⟩ →* ⟨throw e', s',b'⟩"
(*<*)by(rule SeqReds[THEN rtrancl_into_rtrancl, OF _ red_reds.SeqThrow])(*>*)

lemma SeqReds2:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨Val v₁,s₁,b₁⟩"
  and   e₂_steps: "P ⊨ ⟨e₂,s₁,b₁⟩ →* ⟨e₂',s₂,b₂⟩"
shows "P ⊨ ⟨e₁;;e₂, s₀,b₀⟩ →* ⟨e₂',s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(Val v₁;; e₂,s₁,b₁)"
  have "(?x, ?y) ∈ (red P)^*" by(rule SeqReds[OF e₁_steps])
  also have "(?y, ?z) ∈ (red P)^*"
    by(rule RedSeq[THEN converse_rtrancl_into_rtrancl, OF e₂_steps])
  ultimately show ?thesis by simp
qed
(*>*)


subsubsection"If"

lemma CondReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨if (e) e₁ else e₂,s,b⟩ →* ⟨if (e') e₁ else e₂,s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) CondRed[OF step(2)]])
qed
(*>*)

lemma CondRedsThrow:
  "P ⊨ ⟨e,s,b⟩ →* ⟨throw a,s',b'⟩ ==> P ⊨ ⟨if (e) e₁ else e₂, s,b⟩ →* ⟨throw a,s',b'⟩"
(*<*)by(rule CondReds[THEN rtrancl_into_rtrancl, OF _ red_reds.CondThrow])(*>*)

lemma CondReds2T:
assumes e_steps: "P ⊨ ⟨e,s₀,b₀⟩ →* ⟨true,s₁,b₁⟩"
  and   e₁_steps: "P ⊨ ⟨e₁, s₁,b₁⟩ →* ⟨e',s₂,b₂⟩"
shows "P ⊨ ⟨if (e) e₁ else e₂, s₀,b₀⟩ →* ⟨e',s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(if (true) e₁ else e₂,s₁,b₁)"
  have "(?x, ?y) ∈ (red P)^*" by(rule CondReds[OF e_steps])
  also have "(?y, ?z) ∈ (red P)^*"
    by(rule RedCondT[THEN converse_rtrancl_into_rtrancl, OF e₁_steps])
  ultimately show ?thesis by simp
qed
(*>*)

lemma CondReds2F:
assumes e_steps: "P ⊨ ⟨e,s₀,b₀⟩ →* ⟨false,s₁,b₁⟩"
  and   e₂_steps: "P ⊨ ⟨e₂, s₁,b₁⟩ →* ⟨e',s₂,b₂⟩"
shows "P ⊨ ⟨if (e) e₁ else e₂, s₀,b₀⟩ →* ⟨e',s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(if (false) e₁ else e₂,s₁,b₁)"
  have "(?x, ?y) ∈ (red P)^*" by(rule CondReds[OF e_steps])
  also have "(?y, ?z) ∈ (red P)^*"
    by(rule RedCondF[THEN converse_rtrancl_into_rtrancl, OF e₂_steps])
  ultimately show ?thesis by simp
qed
(*>*)


subsubsection "While"

lemma WhileFReds:
assumes b_steps: "P ⊨ ⟨b,s,b₀⟩ →* ⟨false,s',b'⟩"
shows "P ⊨ ⟨while (b) c,s,b₀⟩ →* ⟨unit,s',b'⟩"
(*<*)
by(rule RedWhile[THEN converse_rtrancl_into_rtrancl,
                 OF CondReds[THEN rtrancl_into_rtrancl,
                             OF b_steps RedCondF]])
(*>*)

lemma WhileRedsThrow:
assumes b_steps: "P ⊨ ⟨b,s,b₀⟩ →* ⟨throw e,s',b'⟩"
shows "P ⊨ ⟨while (b) c,s,b₀⟩ →* ⟨throw e,s',b'⟩"
(*<*)
by(rule RedWhile[THEN converse_rtrancl_into_rtrancl,
                 OF CondReds[THEN rtrancl_into_rtrancl,
                             OF b_steps red_reds.CondThrow]])
(*>*)

lemma WhileTReds:
assumes b_steps: "P ⊨ ⟨b,s₀,b₀⟩ →* ⟨true,s₁,b₁⟩"
    and c_steps: "P ⊨ ⟨c,s₁,b₁⟩ →* ⟨Val v₁,s₂,b₂⟩"
    and while_steps: "P ⊨ ⟨while (b) c,s₂,b₂⟩ →* ⟨e,s₃,b₃⟩"
shows "P ⊨ ⟨while (b) c,s₀,b₀⟩ →* ⟨e,s₃,b₃⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  let ?b = "(if (b) (c;; while (b) c) else unit,s₀,b₀)"
  let ?y = "(if (true) (c;; while (b) c) else unit,s₁,b₁)"
  let ?b' = "(c;; while (b) c,s₁,b₁)"
  let ?y' = "(Val v₁;; while (b) c,s₂,b₂)"
  have "(?a, ?b) ∈ (red P)^*"
    using RedWhile[THEN converse_rtrancl_into_rtrancl] by simp
  also have "(?b, ?y) ∈ (red P)^*" by(rule CondReds[OF b_steps])
  also have "(?y, ?b') ∈ (red P)^*"
    using RedCondT[THEN converse_rtrancl_into_rtrancl] by simp
  also have "(?b', ?y') ∈ (red P)^*" by(rule SeqReds[OF c_steps])
  also have "(?y', ?c) ∈ (red P)^*"
    by(rule RedSeq[THEN converse_rtrancl_into_rtrancl, OF while_steps])
  ultimately show ?thesis by simp
qed
(*>*)

lemma WhileTRedsThrow:
assumes b_steps: "P ⊨ ⟨b,s₀,b₀⟩ →* ⟨true,s₁,b₁⟩"
    and c_steps: "P ⊨ ⟨c,s₁,b₁⟩ →* ⟨throw e,s₂,b₂⟩"
shows "P ⊨ ⟨while (b) c,s₀,b₀⟩ →* ⟨throw e,s₂,b₂⟩"
(*<*)(is "(?a, ?c) \<in> (red P)\<^sup>*")
proof -
  let ?b = "(if (b) (c;; while (b) c) else unit,s₀,b₀)"
  let ?y = "(if (true) (c;; while (b) c) else unit,s₁,b₁)"
  let ?b' = "(c;; while (b) c,s₁,b₁)"
  let ?y' = "(throw e;; while (b) c,s₂,b₂)"
  have "(?a, ?b) ∈ (red P)^*"
    using RedWhile[THEN converse_rtrancl_into_rtrancl] by simp
  also have "(?b, ?y) ∈ (red P)^*" by(rule CondReds[OF b_steps])
  also have "(?y, ?b') ∈ (red P)^*"
    using RedCondT[THEN converse_rtrancl_into_rtrancl] by simp
  also have "(?b', ?y') ∈ (red P)^*" by(rule SeqReds[OF c_steps])
  also have "(?y', ?c) ∈ (red P)" by(rule red_reds.SeqThrow)
  ultimately show ?thesis by simp
qed
(*>*)

subsubsection"Throw"

lemma ThrowReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨throw e,s,b⟩ →* ⟨throw e',s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) ThrowRed[OF step(2)]])
qed
(*>*)

lemma ThrowRedsNull:
  "P ⊨ ⟨e,s,b⟩ →* ⟨null,s',b'⟩ ==> P ⊨ ⟨throw e,s,b⟩ →* ⟨THROW NullPointer,s',b'⟩"
(*<*)by(rule ThrowReds[THEN rtrancl_into_rtrancl, OF _ RedThrowNull])(*>*)

lemma ThrowRedsThrow:
  "P ⊨ ⟨e,s,b⟩ →* ⟨throw a,s',b'⟩ ==> P ⊨ ⟨throw e,s,b⟩ →* ⟨throw a,s',b'⟩"
(*<*)by(rule ThrowReds[THEN rtrancl_into_rtrancl, OF _ red_reds.ThrowThrow])(*>*)

subsubsection "InitBlock"

lemma InitBlockReds_aux:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==>
  ∀h l sh h' l' sh' v. s = (h,l(V↦v),sh) ⟶ s' = (h',l',sh') ⟶
  P ⊨ ⟨{V:T := Val v; e},(h,l,sh),b⟩ →* ⟨{V:T := Val(the(l' V)); e'},(h',l'(V:=(l V)),sh'),b'⟩"
(*<*)
proof(induct rule: converse_rtrancl_induct3)
  case refl then show ?case
    by(fastforce simp: fun_upd_same simp del:fun_upd_apply)
next
  case (step e0 s0 b0 e1 s1 b1)
  obtain h1 l1 sh1 where s1[simp]: "s1 = (h1, l1, sh1)" by(cases s1) simp
  { fix h0 l0 sh0 h2 l2 sh2 v0
    assume [simp]: "s0 = (h0, l0(V ↦ v0), sh0)" and s'[simp]: "s' = (h2, l2, sh2)"    
    then have "V ∈ dom l1" using step(1) by(auto dest!: red_lcl_incr)
    then obtain v1 where l1V[simp]: "l1 V = ⌊v1⌋" by blast

    let ?a = "({V:T; V:=Val v0;; e0},(h0, l0, sh0),b0)"
    let ?b = "({V:T; V:=Val v1;; e1},(h1, l1(V := l0 V), sh1),b1)"
    let ?c = "({V:T; V:=Val (the (l2 V));; e'},(h2, l2(V := l0 V), sh2),b')"
    let ?l = "l1(V := l0 V)" and ?v = v1

    have e0_steps: "P ⊨ ⟨e0,(h0, l0(V ↦ v0), sh0),b0⟩ → ⟨e1,(h1, l1, sh1),b1⟩"
      using step(1) by simp

    have lv: "∧l v. l1 = l(V ↦ v) ⟶
             P ⊨ ⟨{V:T; V:=Val v;; e1},(h1, l, sh1),b1⟩ →*
                  ⟨{V:T; V:=Val (the (l2 V));; e'},(h2, l2(V := l V), sh2),b'⟩"
      using step(3) s' s1 by blast
    moreover have "l1 = ?l(V ↦ ?v)" by(rule ext) (simp add:fun_upd_def)
    ultimately have "(?b, ?c) ∈ (red P)^*" using lv[of ?l ?v] by simp
    then have "(?a, ?c) ∈ (red P)^*"
      by(rule InitBlockRed[THEN converse_rtrancl_into_rtrancl, OF e0_steps l1V])
  }
  then show ?case by blast
qed
(*>*)

lemma InitBlockReds:
 "P ⊨ ⟨e, (h,l(V↦v),sh),b⟩ →* ⟨e', (h',l',sh'),b'⟩ ==>
  P ⊨ ⟨{V:T := Val v; e}, (h,l,sh),b⟩ →* ⟨{V:T := Val(the(l' V)); e'}, (h',l'(V:=(l V)),sh'),b'⟩"
(*<*)by(blast dest:InitBlockReds_aux)(*>*)

lemma InitBlockRedsFinal:
  "[ P ⊨ ⟨e,(h,l(V↦v),sh),b⟩ →* ⟨e',(h',l',sh'),b'⟩; final e' ] ==>
  P ⊨ ⟨{V:T := Val v; e},(h,l,sh),b⟩ →* ⟨e',(h', l'(V := l V),sh'),b'⟩"
(*<*)
by(fast elim!:InitBlockReds[THEN rtrancl_into_rtrancl] finalE
        intro:RedInitBlock InitBlockThrow)
(*>*)


subsubsection "Block"

lemmas converse_rtranclE3 = converse_rtranclE [of "(xa,xb,xc)" "(za,zb,zc)", split_rule]

lemma BlockRedsFinal:
assumes reds: "P ⊨ ⟨e₀,s₀,b₀⟩ →* ⟨e₂,(h₂,l₂,sh₂),b₂⟩" and fin: "final e₂"
shows "∧h₀ l₀ sh₀. s₀ = (h₀,l₀(V:=None),sh₀) ==> P ⊨ ⟨{V:T; e₀},(h₀,l₀,sh₀),b₀⟩ →* ⟨e₂,(h₂,l₂(V:=l₀ V),sh₂),b₂⟩"
(*<*)
using reds
proof (induct rule:converse_rtrancl_induct3)
  case refl thus ?case
    by(fastforce intro:finalE[OF fin] RedBlock BlockThrow
                simp del:fun_upd_apply)
next
  case (step e₀ s₀ b₀ e₁ s₁ b₁)
  have red: "P ⊨ ⟨e₀,s₀,b₀⟩ → ⟨e₁,s₁,b₁⟩"
   and reds: "P ⊨ ⟨e₁,s₁,b₁⟩ →* ⟨e₂,(h₂,l₂,sh₂),b₂⟩"
   and IH: "∧h l sh. s₁ = (h,l(V := None),sh)
                ==> P ⊨ ⟨{V:T; e₁},(h,l,sh),b₁⟩ →* ⟨e₂,(h₂, l₂(V := l V),sh₂),b₂⟩"
   and s₀: "s₀ = (h₀, l₀(V := None),sh₀)" by fact+
  obtain h₁ l₁ sh₁ where s₁: "s₁ = (h₁,l₁,sh₁)"
    using prod_cases3 by blast
  show ?case
  proof cases
    assume "assigned V e₀"
    then obtain v e where e₀: "e₀ = V := Val v;; e"
      by (unfold assigned_def)blast
    from red e₀ s₀ have e₁: "e₁ = unit;;e" and s₁: "s₁ = (h₀, l₀(V ↦ v),sh₀)" and b₁: "b₁ = b₀"
      by auto
    from e₁ fin have "e₁ ≠ e₂" by (auto simp:final_def)
    then obtain e' s' b' where red1: "P ⊨ ⟨e₁,s₁,b₁⟩ → ⟨e',s',b'⟩"
      and reds': "P ⊨ ⟨e',s',b'⟩ →* ⟨e₂,(h₂,l₂,sh₂),b₂⟩"
      using converse_rtranclE3[OF reds] by blast
    from red1 e₁ b₁ have es': "e' = e" "s' = s₁" "b' = b₀" by auto
    show ?case using e₀ s₁ es' reds'
      by(auto intro!: InitBlockRedsFinal[OF _ fin] simp del:fun_upd_apply)
  next
    assume unass: "¬ assigned V e₀"
    show ?thesis
    proof (cases "l₁ V")
      assume None: "l₁ V = None"
      hence "P ⊨ ⟨{V:T; e₀},(h₀,l₀,sh₀),b₀⟩ → ⟨{V:T; e₁},(h₁, l₁(V := l₀ V),sh₁),b₁⟩"
        using s₀ s₁ red by(simp add: BlockRedNone[OF _ _ unass])
      moreover
      have "P ⊨ ⟨{V:T; e₁},(h₁, l₁(V := l₀ V),sh₁),b₁⟩ →* ⟨e₂,(h₂, l₂(V := l₀ V),sh₂),b₂⟩"
        using IH[of _ "l₁(V := l₀ V)"] s₁ None by(simp add:fun_upd_idem)
      ultimately show ?case by(rule converse_rtrancl_into_rtrancl)
    next
      fix v assume Some: "l₁ V = Some v"
      hence "P ⊨ ⟨{V:T;e₀},(h₀,l₀,sh₀),b₀⟩ → ⟨{V:T := Val v; e₁},(h₁,l₁(V := l₀ V),sh₁),b₁⟩"
        using s₀ s₁ red by(simp add: BlockRedSome[OF _ _ unass])
      moreover
      have "P ⊨ ⟨{V:T := Val v; e₁},(h₁,l₁(V:= l₀ V),sh₁),b₁⟩ →*
                ⟨e₂,(h₂,l₂(V:=l₀ V),sh₂),b₂⟩"
        using InitBlockRedsFinal[OF _ fin,of _ _ "l₁(V:=l₀ V)" V]
              Some reds s₁ by(simp add:fun_upd_idem)
      ultimately show ?case by(rule converse_rtrancl_into_rtrancl)
    qed
  qed
qed
(*>*)


subsubsection "try-catch"

lemma TryReds:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨try e catch(C V) e₂,s,b⟩ →* ⟨try e' catch(C V) e₂,s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) TryRed[OF step(2)]])
qed
(*>*)

lemma TryRedsVal:
  "P ⊨ ⟨e,s,b⟩ →* ⟨Val v,s',b'⟩ ==> P ⊨ ⟨try e catch(C V) e₂,s,b⟩ →* ⟨Val v,s',b'⟩"
(*<*)by(rule TryReds[THEN rtrancl_into_rtrancl, OF _ RedTry])(*>*)

lemma TryCatchRedsFinal:
assumes e₁_steps: "P ⊨ ⟨e₁,s₀,b₀⟩ →* ⟨Throw a,(h₁,l₁,sh₁),b₁⟩"
  and h₁a: "h₁ a = Some(D,fs)" and sub: "P ⊨ D ⪯^* C"
  and e₂_steps: "P ⊨ ⟨e₂, (h₁, l₁(V ↦ Addr a),sh₁),b₁⟩ →* ⟨e₂', (h₂,l₂,sh₂), b₂⟩"
  and final: "final e₂'"
shows "P ⊨ ⟨try e₁ catch(C V) e₂, s₀, b₀⟩ →* ⟨e₂', (h₂, (l₂::locals)(V := l₁ V),sh₂),b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(try Throw a catch(C V) e₂,(h₁, l₁, sh₁),b₁)"
  let ?b = "({V:Class C; V:=addr a;; e₂},(h₁, l₁, sh₁),b₁)"
  have bz: "(?b, ?z) ∈ (red P)^*"
    by(rule InitBlockRedsFinal[OF e₂_steps final])
  have hp: "hp (h₁, l₁, sh₁) a = ⌊(D, fs)⌋" using h₁a by simp
  have "(?x, ?y) ∈ (red P)^*" by(rule TryReds[OF e₁_steps])
  also have "(?y, ?z) ∈ (red P)^*"
    by(rule RedTryCatch[THEN converse_rtrancl_into_rtrancl, OF hp sub bz])
  ultimately show ?thesis by simp
qed
(*>*)

lemma TryRedsFail:
  "[ P ⊨ ⟨e₁,s,b⟩ →* ⟨Throw a,(h,l,sh),b'⟩; h a = Some(D,fs); ¬ P ⊨ D ⪯^* C ]
  ==> P ⊨ ⟨try e₁ catch(C V) e₂,s,b⟩ →* ⟨Throw a,(h,l,sh),b'⟩"
(*<*)by(fastforce intro!: TryReds[THEN rtrancl_into_rtrancl, OF _ RedTryFail])(*>*)

subsubsection "List"

lemma ListReds1:
  "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨e#es,s,b⟩ [→]* ⟨e' # es,s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) ListRed1[OF step(2)]])
qed
(*>*)

lemma ListReds2:
  "P ⊨ ⟨es,s,b⟩ [→]* ⟨es',s',b'⟩ ==> P ⊨ ⟨Val v # es,s,b⟩ [→]* ⟨Val v # es',s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) ListRed2[OF step(2)]])
qed
(*>*)

lemma ListRedsVal:
  "[ P ⊨ ⟨e,s₀,b₀⟩ →* ⟨Val v,s₁,b₁⟩; P ⊨ ⟨es,s₁,b₁⟩ [→]* ⟨es',s₂,b₂⟩ ]
  ==> P ⊨ ⟨e#es,s₀,b₀⟩ [→]* ⟨Val v # es',s₂,b₂⟩"
(*<*)by(rule rtrancl_trans[OF ListReds1 ListReds2])(*>*)

subsubsection"Call"

text‹ First a few lemmas on what happens to free variables during redction. ›

lemma assumes wf: "wwf_J_prog P"
shows Red_fv: "P ⊨ ⟨e,(h,l,sh),b⟩ → ⟨e',(h',l',sh'),b'⟩ ==> fv e' ⊆ fv e"
  and  "P ⊨ ⟨es,(h,l,sh),b⟩ [→] ⟨es',(h',l',sh'),b'⟩ ==> fvs es' ⊆ fvs es"
(*<*)
proof (induct rule:red_reds_inducts)
  case (RedCall h a C fs M Ts T pns body D vs l sh b)
  hence "fv body ⊆ {this} ∪ set pns"
    using assms by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)
  with RedCall.hyps show ?case by fastforce
next
  case (RedSCall C M Ts T pns body D vs)
  hence "fv body ⊆ set pns"
    using assms by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)
  with RedSCall.hyps show ?case by fastforce
qed auto
(*>*)


lemma Red_dom_lcl:
  "P ⊨ ⟨e,(h,l,sh),b⟩ → ⟨e',(h',l',sh'),b'⟩ ==> dom l' ⊆ dom l ∪ fv e" and
  "P ⊨ ⟨es,(h,l,sh),b⟩ [→] ⟨es',(h',l',sh'),b'⟩ ==> dom l' ⊆ dom l ∪ fvs es"
(*<*)
proof (induct rule:red_reds_inducts)
  case RedLAss thus ?case by(force split:if_splits)
next
  case CallParams thus ?case by(force split:if_splits)
next
  case BlockRedNone thus ?case by clarsimp (fastforce split:if_splits)
next
  case BlockRedSome thus ?case by clarsimp (fastforce split:if_splits)
next
  case InitBlockRed thus ?case by clarsimp (fastforce split:if_splits)
qed auto
(*>*)

lemma Reds_dom_lcl:
assumes wf: "wwf_J_prog P"
shows "P ⊨ ⟨e,(h,l,sh),b⟩ →* ⟨e',(h',l',sh'),b'⟩ ==> dom l' ⊆ dom l ∪ fv e"
(*<*)
proof(induct rule: converse_rtrancl_induct_red)
  case 1 then show ?case by blast
next
  case 2 then show ?case using wf by(blast dest: Red_fv Red_dom_lcl)
qed
(*>*)

text‹ Now a few lemmas on the behaviour of blocks during reduction. ›

lemma override_on_upd_lemma:
  "(override_on f (g(a↦b)) A)(a := g a) = override_on f g (insert a A)"
(*<*)by(rule ext) (simp add:override_on_def)

declare fun_upd_apply[simp del] map_upds_twist[simp del]
(*>*)


lemma blocksReds:
  "∧l. [ length Vs = length Ts; length vs = length Ts; distinct Vs;
         P ⊨ ⟨e, (h,l(Vs [↦] vs),sh),b⟩ →* ⟨e', (h',l',sh'),b'⟩ ]
        ==> P ⊨ ⟨blocks(Vs,Ts,vs,e), (h,l,sh),b⟩ →* ⟨blocks(Vs,Ts,map (the ∘ l') Vs,e'), (h',override_on l' l (set Vs),sh'),b'⟩"
(*<*)
proof(induct Vs Ts vs e rule:blocks_induct)
  case (1 V Vs T Ts v vs e) show ?case
    using InitBlockReds[OF "1.hyps"[of "l(V↦v)"]] "1.prems"
    by(auto simp:override_on_upd_lemma)
qed auto
(*>*)


lemma blocksFinal:
 "∧l. [ length Vs = length Ts; length vs = length Ts; final e ] ==>
       P ⊨ ⟨blocks(Vs,Ts,vs,e), (h,l,sh),b⟩ →* ⟨e, (h,l,sh),b⟩"
(*<*)
proof(induct Vs Ts vs e rule:blocks_induct)
  case 1
  show ?case using "1.prems" InitBlockReds[OF "1.hyps"]
    by(fastforce elim!:finalE elim: rtrancl_into_rtrancl[OF _ RedInitBlock]
                                   rtrancl_into_rtrancl[OF _ InitBlockThrow])
qed auto
(*>*)


lemma blocksRedsFinal:
assumes wf: "length Vs = length Ts" "length vs = length Ts" "distinct Vs"
    and reds: "P ⊨ ⟨e, (h,l(Vs [↦] vs),sh),b⟩ →* ⟨e', (h',l',sh'),b'⟩"
    and fin: "final e'" and l'': "l'' = override_on l' l (set Vs)"
shows "P ⊨ ⟨blocks(Vs,Ts,vs,e), (h,l,sh),b⟩ →* ⟨e', (h',l'',sh'),b'⟩"
(*<*)
proof -
  let ?bv = "blocks(Vs,Ts,map (the o l') Vs,e')"
  have "P ⊨ ⟨blocks(Vs,Ts,vs,e), (h,l,sh),b⟩ →* ⟨?bv, (h',l'',sh'),b'⟩"
    using l'' by simp (rule blocksReds[OF wf reds])
  also have "P ⊨ ⟨?bv, (h',l'',sh'),b'⟩ →* ⟨e', (h',l'',sh'),b'⟩"
    using wf by(fastforce intro:blocksFinal fin)
  finally show ?thesis .
qed
(*>*)

text‹ An now the actual method call reduction lemmas. ›

lemma CallRedsObj:
 "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩ ==> P ⊨ ⟨e∙M(es),s,b⟩ →* ⟨e'∙M(es),s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) CallObj[OF step(2)]])
qed
(*>*)


lemma CallRedsParams:
 "P ⊨ ⟨es,s,b⟩ [→]* ⟨es',s',b'⟩ ==> P ⊨ ⟨(Val v)∙M(es),s,b⟩ →* ⟨(Val v)∙M(es'),s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) CallParams[OF step(2)]])
qed
(*>*)


lemma CallRedsFinal:
assumes wwf: "wwf_J_prog P"
and "P ⊨ ⟨e,s₀,b₀⟩ →* ⟨addr a,s₁,b₁⟩"
      "P ⊨ ⟨es,s₁,b₁⟩ [→]* ⟨map Val vs,(h₂,l₂,sh₂),b₂⟩"
      "h₂ a = Some(C,fs)" "P ⊨ C sees M,NonStatic:Ts→T = (pns,body) in D"
      "size vs = size pns"
and l₂': "l₂' = [this ↦ Addr a, pns[↦]vs]"
and body: "P ⊨ ⟨body,(h₂,l₂',sh₂),b₂⟩ →* ⟨ef,(h₃,l₃,sh₃),b₃⟩"
and "final ef"
shows "P ⊨ ⟨e∙M(es), s₀,b₀⟩ →* ⟨ef,(h₃,l₂,sh₃),b₃⟩"
(*<*)
proof -
  have wf: "size Ts = size pns ∧ distinct pns ∧ this ∉ set pns"
    and wt: "fv body ⊆ {this} ∪ set pns"
    using assms by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  from body[THEN Red_lcl_add, of l₂]
  have body': "P ⊨ ⟨body,(h₂,l₂(this↦ Addr a, pns[↦]vs),sh₂),b₂⟩ →* ⟨ef,(h₃,l₂++l₃,sh₃),b₃⟩"
    by (simp add:l₂')
  have "dom l₃ ⊆ {this} ∪ set pns"
    using Reds_dom_lcl[OF wwf body] wt l₂' set_take_subset by force
  hence eql₂: "override_on (l₂++l₃) l₂ ({this} ∪ set pns) = l₂"
    by(fastforce simp add:map_add_def override_on_def fun_eq_iff)
  have "P ⊨ ⟨e∙M(es),s₀,b₀⟩ →* ⟨(addr a)∙M(es),s₁,b₁⟩" by(rule CallRedsObj)(rule assms(2))
  also have "P ⊨ ⟨(addr a)∙M(es),s₁,b₁⟩ →*
                 ⟨(addr a)∙M(map Val vs),(h₂,l₂,sh₂),b₂⟩"
    by(rule CallRedsParams)(rule assms(3))
  also have "P ⊨ ⟨(addr a)∙M(map Val vs), (h₂,l₂,sh₂),b₂⟩ →
                 ⟨blocks(this#pns, Class D#Ts, Addr a#vs, body), (h₂,l₂,sh₂),b₂⟩"
    by(rule RedCall)(auto simp: assms wf, rule assms(5))
  also (rtrancl_into_rtrancl) have "P ⊨ ⟨blocks(this#pns, Class D#Ts, Addr a#vs, body), (h₂,l₂,sh₂),b₂⟩
                 →* ⟨ef,(h₃,override_on (l₂++l₃) l₂ ({this} ∪ set pns),sh₃),b₃⟩"
    by(rule blocksRedsFinal, insert assms wf body', simp_all)
  finally show ?thesis using eql₂ by simp
qed
(*>*)


lemma CallRedsThrowParams:
assumes e_steps: "P ⊨ ⟨e,s₀,b₀⟩ →* ⟨Val v,s₁,b₁⟩"
  and es_steps: "P ⊨ ⟨es,s₁,b₁⟩ [→]* ⟨map Val vs₁ @ throw a # es₂,s₂,b₂⟩"
shows "P ⊨ ⟨e∙M(es),s₀,b₀⟩ →* ⟨throw a,s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(Val v∙M(es),s₁,b₁)"
  let ?y' = "(Val v∙M(map Val vs₁ @ throw a # es₂),s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule CallRedsObj[OF e_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule CallRedsParams[OF es_steps])
  also have "(?y', ?z) ∈ (red P)^*" using CallThrowParams by fast
  ultimately show ?thesis by simp
qed
(*>*)


lemma CallRedsThrowObj:
  "P ⊨ ⟨e,s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩ ==> P ⊨ ⟨e∙M(es),s₀,b₀⟩ →* ⟨throw a,s₁,b₁⟩"
(*<*)by(rule CallRedsObj[THEN rtrancl_into_rtrancl, OF _ CallThrowObj])(*>*)


lemma CallRedsNull:
assumes e_steps: "P ⊨ ⟨e,s₀,b₀⟩ →* ⟨null,s₁,b₁⟩"
  and es_steps: "P ⊨ ⟨es,s₁,b₁⟩ [→]* ⟨map Val vs,s₂,b₂⟩"
shows "P ⊨ ⟨e∙M(es),s₀,b₀⟩ →* ⟨THROW NullPointer,s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(null∙M(es),s₁,b₁)"
  let ?y' = "(null∙M(map Val vs),s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule CallRedsObj[OF e_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule CallRedsParams[OF es_steps])
  also have "(?y', ?z) ∈ (red P)" by(rule RedCallNull)
  ultimately show ?thesis by simp
qed
(*>*)

lemma CallRedsNone:
assumes e_steps: "P ⊨ ⟨e,s,b⟩ →* ⟨addr a,s₁,b₁⟩"
  and es_steps: "P ⊨ ⟨es,s₁,b₁⟩ [→]* ⟨map Val vs,s₂,b₂⟩"
  and hp₂a: "hp s₂ a = Some(C,fs)"
  and ncM: "¬(∃b Ts T m D. P ⊨ C sees M,b:Ts→T = m in D)"
shows "P ⊨ ⟨e∙M(es),s,b⟩ →* ⟨THROW NoSuchMethodError,s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(addr a∙M(es),s₁,b₁)"
  let ?y' = "(addr a∙M(map Val vs),s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule CallRedsObj[OF e_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule CallRedsParams[OF es_steps])
  also have "(?y', ?z) ∈ (red P)" using RedCallNone[OF _ ncM] hp₂a
    by(cases s₂) simp
  ultimately show ?thesis by simp
qed
(*>*)

lemma CallRedsStatic:
assumes e_steps: "P ⊨ ⟨e,s,b⟩ →* ⟨addr a,s₁,b₁⟩"
  and es_steps: "P ⊨ ⟨es,s₁,b₁⟩ [→]* ⟨map Val vs,s₂,b₂⟩"
  and hp₂a: "hp s₂ a = Some(C,fs)"
  and cM_Static: "P ⊨ C sees M,Static:Ts→T = m in D"
shows "P ⊨ ⟨e∙M(es),s,b⟩ →* ⟨THROW IncompatibleClassChangeError,s₂,b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(addr a∙M(es),s₁,b₁)"
  let ?y' = "(addr a∙M(map Val vs),s₂,b₂)"
  have "(?x, ?y) ∈ (red P)^*" by(rule CallRedsObj[OF e_steps])
  also have "(?y, ?y') ∈ (red P)^*" by(rule CallRedsParams[OF es_steps])
  also have "(?y', ?z) ∈ (red P)" using RedCallStatic[OF _ cM_Static] hp₂a
    by(cases s₂) simp
  ultimately show ?thesis by simp
qed
(*>*)

subsection‹SCall›

lemma SCallRedsParams:
 "P ⊨ ⟨es,s,b⟩ [→]* ⟨es',s',b'⟩ ==> P ⊨ ⟨C∙_sM(es),s,b⟩ →* ⟨C∙_sM(es'),s',b'⟩"
(*<*)
proof(induct rule: rtrancl_induct3)
  case refl show ?case by blast
next
  case step show ?case
   by(rule rtrancl_into_rtrancl[OF step(3) SCallParams[OF step(2)]])
qed
(*>*)

lemma SCallRedsFinal:
assumes wwf: "wwf_J_prog P"
and "P ⊨ ⟨es,s₀,b₀⟩ [→]* ⟨map Val vs,(h₂,l₂,sh₂),b₂⟩"
      "P ⊨ C sees M,Static:Ts→T = (pns,body) in D"
      "sh₂ D = Some(sfs,Done) ∨ (M = clinit ∧ sh₂ D = ⌊(sfs, Processing)⌋)"
      "size vs = size pns"
and l₂': "l₂' = [pns[↦]vs]"
and body: "P ⊨ ⟨body,(h₂,l₂',sh₂),False⟩ →* ⟨ef,(h₃,l₃,sh₃),b₃⟩"
and "final ef"
shows "P ⊨ ⟨C∙_sM(es), s₀,b₀⟩ →* ⟨ef,(h₃,l₂,sh₃),b₃⟩"
(*<*)
proof -
  have wf: "size Ts = size pns ∧ distinct pns"
    and wt: "fv body ⊆ set pns"
    using assms by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  from body[THEN Red_lcl_add, of l₂]
  have body': "P ⊨ ⟨body,(h₂,l₂(pns[↦]vs),sh₂),False⟩ →* ⟨ef,(h₃,l₂++l₃,sh₃),b₃⟩"
    by (simp add:l₂')
  have "dom l₃ ⊆ set pns"
    using Reds_dom_lcl[OF wwf body] wt l₂' set_take_subset by force
  hence eql₂: "override_on (l₂++l₃) l₂ (set pns) = l₂"
    by(fastforce simp add:map_add_def override_on_def fun_eq_iff)
  have b2T: "P ⊨ ⟨C∙_sM(map Val vs), (h₂,l₂,sh₂),b₂⟩ →* ⟨C∙_sM(map Val vs), (h₂,l₂,sh₂),True⟩"
  proof(cases b₂)
    case True then show ?thesis by simp
  next
    case False then show ?thesis using assms(3,4) by(auto elim: SCallInitDoneRed)
  qed
  have "P ⊨ ⟨C∙_sM(es),s₀,b₀⟩ →* ⟨C∙_sM(map Val vs),(h₂,l₂,sh₂),b₂⟩"
    by(rule SCallRedsParams)(rule assms(2))
  also have "P ⊨ ⟨C∙_sM(map Val vs), (h₂,l₂,sh₂),b₂⟩ →* ⟨blocks(pns, Ts, vs, body), (h₂,l₂,sh₂),False⟩"
    by(auto intro!: rtrancl_into_rtrancl[OF b2T] RedSCall assms(3) simp: assms wf)
  also (rtrancl_trans) have "P ⊨ ⟨blocks(pns, Ts, vs, body), (h₂,l₂,sh₂),False⟩
                 →* ⟨ef,(h₃,override_on (l₂++l₃) l₂ (set pns),sh₃),b₃⟩"
    by(rule blocksRedsFinal, insert assms wf body', simp_all)
  finally show ?thesis using eql₂ by simp
qed
(*>*)

lemma SCallRedsThrowParams:
  "[ P ⊨ ⟨es,s₀,b₀⟩ [→]* ⟨map Val vs₁ @ throw a # es₂,s₂,b₂⟩ ]
  ==> P ⊨ ⟨C∙_sM(es),s₀,b₀⟩ →* ⟨throw a,s₂,b₂⟩"
(*<*)
by(erule SCallRedsParams[THEN rtrancl_into_rtrancl, OF _ SCallThrowParams])
   simp
(*>*)

lemma SCallRedsNone:
  "[ P ⊨ ⟨es,s,b⟩ [→]* ⟨map Val vs,s₂,False⟩;
    ¬(∃b Ts T m D. P ⊨ C sees M,b:Ts→T = m in D) ]
  ==> P ⊨ ⟨C∙_sM(es),s,b⟩ →* ⟨THROW NoSuchMethodError,s₂,False⟩"
(*<*)
by(erule SCallRedsParams[THEN rtrancl_into_rtrancl, OF _ RedSCallNone])
   simp
(*>*)

lemma SCallRedsNonStatic:
  "[ P ⊨ ⟨es,s,b⟩ [→]* ⟨map Val vs,s₂,False⟩;
     P ⊨ C sees M,NonStatic:Ts→T = m in D ]
  ==> P ⊨ ⟨C∙_sM(es),s,b⟩ →* ⟨THROW IncompatibleClassChangeError,s₂,False⟩"
(*<*)
by(erule SCallRedsParams[THEN rtrancl_into_rtrancl, OF _ RedSCallNonStatic])
   simp
(*>*)

lemma SCallInitThrowReds:
assumes wwf: "wwf_J_prog P"
and "P ⊨ ⟨es,s₀,b₀⟩ [→]* ⟨map Val vs,(h₁,l₁,sh₁),False⟩"
      "P ⊨ C sees M,Static:Ts→T = (pns,body) in D"
      "∄sfs. sh₁ D = Some(sfs,Done)"
      "M ≠ clinit"
and "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁,l₁,sh₁),False⟩ →* ⟨throw a,(h₂,l₂,sh₂),b₂⟩"
shows "P ⊨ ⟨C∙_sM(es), s₀,b₀⟩ →* ⟨throw a,(h₂,l₂,sh₂),b₂⟩"
(*<*)(is "(?x, ?z) \<in> (red P)\<^sup>*")
proof -
  let ?y = "(C∙_sM(map Val vs),(h₁,l₁,sh₁),False)"
  let ?y' = "(INIT D ([D],False) ← C∙_sM(map Val vs),(h₁,l₁,sh₁),False)"
  have "(?x, ?y) ∈ (red P)^*" by(rule SCallRedsParams[OF assms(2)])
  also have "(?y, ?y') ∈ (red P)^*"
    using SCallInitRed[OF assms(3)] assms(4-5) by auto
  also have "(?y', ?z) ∈ (red P)^*" by(rule InitSeqThrowReds[OF assms(6)])
  finally show ?thesis by simp
qed
(*>*)

lemma SCallInitReds:
assumes wwf: "wwf_J_prog P"
and "P ⊨ ⟨es,s₀,b₀⟩ [→]* ⟨map Val vs,(h₁,l₁,sh₁),False⟩"
      "P ⊨ C sees M,Static:Ts→T = (pns,body) in D"
      "∄sfs. sh₁ D = Some(sfs,Done)"
      "M ≠ clinit"
and "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁,l₁,sh₁),False⟩ →* ⟨Val v',(h₂,l₂,sh₂),b₂⟩"
and "size vs = size pns"
and l₂': "l₂' = [pns[↦]vs]"
and body: "P ⊨ ⟨body,(h₂,l₂',sh₂),False⟩ →* ⟨ef,(h₃,l₃,sh₃),b₃⟩"
and "final ef"
shows "P ⊨ ⟨C∙_sM(es),s₀,b₀⟩ →* ⟨ef,(h₃,l₂,sh₃),b₃⟩"
(*<*)
proof -
  have wf: "size Ts = size pns ∧ distinct pns"
    and wt: "fv body ⊆ set pns"
    using assms by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  from body[THEN Red_lcl_add, of l₂]
  have body': "P ⊨ ⟨body,(h₂,l₂(pns[↦]vs),sh₂),False⟩ →* ⟨ef,(h₃,l₂++l₃,sh₃),b₃⟩"
    by (simp add:l₂')
  have "dom l₃ ⊆ set pns"
    using Reds_dom_lcl[OF wwf body] wt l₂' set_take_subset by force
  hence eql₂: "override_on (l₂++l₃) l₂ (set pns) = l₂"
    by(fastforce simp add:map_add_def override_on_def fun_eq_iff)
  have "icheck P D (C∙_sM(map Val vs)::'a exp)" using assms(3) by auto
  then have "P ⊨ ⟨C∙_sM(map Val vs),(h₂, l₂, sh₂),icheck P D (C∙_sM(map Val vs))⟩
       → ⟨blocks(pns, Ts, vs, body), (h₂, l₂, sh₂), False⟩"
    by (metis (full_types) assms(3) assms(7) local.wf red_reds.RedSCall)
  also have "P ⊨ ⟨blocks(pns, Ts, vs, body), (h₂, l₂, sh₂), False⟩
         →* ⟨ef,(h₃,override_on (l₂++l₃) l₂ (set pns),sh₃),b₃⟩"
    by(rule blocksRedsFinal, insert assms wf body', simp_all)
  finally have trueReds: "P ⊨ ⟨C∙_sM(map Val vs),(h₂, l₂, sh₂),icheck P D (C∙_sM(map Val vs))⟩
                   →* ⟨ef,(h₃,override_on (l₂++l₃) l₂ (set pns),sh₃),b₃⟩" by simp
  have "P ⊨ ⟨C∙_sM(es),s₀,b₀⟩ →* ⟨C∙_sM(map Val vs),(h₁,l₁,sh₁),False⟩"
    by(rule SCallRedsParams)(rule assms(2))
  also have "P ⊨ ⟨C∙_sM(map Val vs),(h₁,l₁,sh₁),False⟩ → ⟨INIT D ([D],False) ← C∙_sM(map Val vs),(h₁,l₁,sh₁),False⟩"
    using SCallInitRed[OF assms(3)] assms(4-5) by auto
  also (rtrancl_into_rtrancl) have "P ⊨ ⟨INIT D ([D],False) ← C∙_sM(map Val vs),(h₁,l₁,sh₁),False⟩
                 →* ⟨ef,(h₃,override_on (l₂++l₃) l₂ (set pns),sh₃),b₃⟩"
    using InitSeqReds[OF assms(6) trueReds] assms(5) by simp
  finally show ?thesis using eql₂ by simp
qed
(*>*)

lemma SCallInitProcessingReds:
assumes wwf: "wwf_J_prog P"
and "P ⊨ ⟨es,s₀,b₀⟩ [→]* ⟨map Val vs,(h₂,l₂,sh₂),b₂⟩"
      "P ⊨ C sees M,Static:Ts→T = (pns,body) in D"
      "sh₂ D = Some(sfs,Processing)"
and "size vs = size pns"
and l₂': "l₂' = [pns[↦]vs]"
and body: "P ⊨ ⟨body,(h₂,l₂',sh₂),False⟩ →* ⟨ef,(h₃,l₃,sh₃),b₃⟩"
and "final ef"
shows "P ⊨ ⟨C∙_sM(es),s₀,b₀⟩ →* ⟨ef,(h₃,l₂,sh₃),b₃⟩"
(*<*)
proof -
  have wf: "size Ts = size pns ∧ distinct pns"
    and wt: "fv body ⊆ set pns"
    using assms by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  from body[THEN Red_lcl_add, of l₂]
  have body': "P ⊨ ⟨body,(h₂,l₂(pns[↦]vs),sh₂),False⟩ →* ⟨ef,(h₃,l₂++l₃,sh₃),b₃⟩"
    by (simp add:l₂')
  have "dom l₃ ⊆ set pns"
    using Reds_dom_lcl[OF wwf body] wt l₂' set_take_subset by force
  hence eql₂: "override_on (l₂++l₃) l₂ (set pns) = l₂"
    by(fastforce simp add:map_add_def override_on_def fun_eq_iff)
  have b2T: "P ⊨ ⟨C∙_sM(map Val vs), (h₂,l₂,sh₂),b₂⟩ →* ⟨C∙_sM(map Val vs), (h₂,l₂,sh₂),True⟩"
  proof(cases b₂)
    case True then show ?thesis by simp
  next
    case False
    show ?thesis
    proof(cases "M = clinit")
      case True then show ?thesis using False assms(3) red_reds.SCallInitDoneRed assms(4)
        by (simp add: r_into_rtrancl)
    next
      case nclinit: False
      have icheck: "icheck P D (C∙_sM(map Val vs))" using assms(3) by auto
      have "P ⊨ ⟨C∙_sM(map Val vs),(h₂, l₂, sh₂),b₂⟩
         → ⟨INIT D ([D],False) ← C∙_sM(map Val vs),(h₂, l₂, sh₂),False⟩"
        using SCallInitRed[OF assms(3)] assms(4) False nclinit by simp
      also have "P ⊨ ⟨INIT D ([D],False) ← C∙_sM(map Val vs),(h₂, l₂, sh₂),False⟩
         → ⟨INIT D (Nil,True) ← C∙_sM(map Val vs),(h₂, l₂, sh₂),False⟩"
        using RedInitProcessing assms(4) by simp
      also have "P ⊨ ⟨INIT D (Nil,True) ← C∙_sM(map Val vs),(h₂, l₂, sh₂),False⟩
         → ⟨C∙_sM(map Val vs),(h₂, l₂, sh₂),True⟩"
        using RedInit[of "C∙_sM(map Val vs)" D _ _ _ P] icheck nclinit
         by (metis (full_types) nsub_RI_Vals sub_RI.simps(12))
      finally show ?thesis by simp
    qed
  qed
  have "P ⊨ ⟨C∙_sM(es),s₀,b₀⟩ →* ⟨C∙_sM(map Val vs),(h₂,l₂,sh₂),b₂⟩"
    by(rule SCallRedsParams)(rule assms(2))
  also have "P ⊨ ⟨C∙_sM(map Val vs), (h₂,l₂,sh₂),b₂⟩ →* ⟨blocks(pns, Ts, vs, body), (h₂,l₂,sh₂),False⟩"
    by(auto intro!: rtrancl_into_rtrancl[OF b2T] RedSCall assms(3) simp: assms wf)
  also (rtrancl_trans) have "P ⊨ ⟨blocks(pns, Ts, vs, body), (h₂,l₂,sh₂),False⟩
                 →* ⟨ef,(h₃,override_on (l₂++l₃) l₂ (set pns),sh₃),b₃⟩"
    by(rule blocksRedsFinal, insert assms wf body', simp_all)
  finally show ?thesis using eql₂ by simp
qed
(*>*)

(***********************************)

subsubsection "The main Theorem"

lemma assumes wwf: "wwf_J_prog P"
shows big_by_small: "P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩
   ==> (∧b. iconf (shp s) e ==> P,shp s ⊨_b (e,b) √ ==> P ⊨ ⟨e,s,b⟩ →* ⟨e',s',False⟩)"
and bigs_by_smalls: "P ⊨ ⟨es,s⟩ [==>] ⟨es',s'⟩
   ==> (∧b. iconfs (shp s) es ==> P,shp s ⊨_b (es,b) √ ==> P ⊨ ⟨es,s,b⟩ [→]* ⟨es',s',False⟩)"
(*<*)
proof (induct rule: eval_evals.inducts)
  case New show ?case
  proof(cases b)
    case True then show ?thesis using RedNew[OF New.hyps(2-4)] by auto
  next
    case False then show ?thesis using New.hyps(1) NewInitDoneReds[OF _ New.hyps(2-4)] by auto
  qed
next
  case NewFail show ?case
  proof(cases b)
    case True then show ?thesis using RedNewFail[OF NewFail.hyps(2)] NewFail.hyps(3) by fastforce
  next
    case False
    then show ?thesis using NewInitDoneReds2[OF _ NewFail.hyps(2)] NewFail by fastforce
  qed
next
  case (NewInit sh C h l v' h' l' sh' a FDTs h'') show ?case
  proof(cases b)
    case True
    then obtain sfs where shC: "sh C = ⌊(sfs, Processing)⌋"
      using NewInit.hyps(1) NewInit.prems by(clarsimp simp: bconf_def initPD_def)
    then have s': "(h',l',sh') = (h,l,sh)" using NewInit.hyps(2) init_ProcessingE by clarsimp
    then show ?thesis using RedNew[OF NewInit.hyps(4-6)] True by auto
  next
    case False
    then have init: "P ⊨ ⟨INIT C ([C],False) ← unit,(h, l, sh),False⟩ →* ⟨Val v',(h', l', sh'),False⟩"
      using NewInit.hyps(3) by(auto simp: bconf_def)
    then show ?thesis using NewInit NewInitReds[OF _ init NewInit.hyps(4-6)] False
     has_fields_is_class[OF NewInit.hyps(5)] by auto
  qed
next
  case (NewInitOOM sh C h l v' h' l' sh') show ?case
  proof(cases b)
    case True
    then obtain sfs where shC: "sh C = ⌊(sfs, Processing)⌋"
      using NewInitOOM.hyps(1) NewInitOOM.prems by(clarsimp simp: bconf_def initPD_def)
    then have s': "(h',l',sh') = (h,l,sh)" using NewInitOOM.hyps(2) init_ProcessingE by clarsimp
    then show ?thesis using RedNewFail[OF NewInitOOM.hyps(4)] True r_into_rtrancl NewInitOOM.hyps(5)
      by auto
  next
    case False
    then have init: "P ⊨ ⟨INIT C ([C],False) ← unit,(h, l, sh),False⟩ →* ⟨Val v',(h', l', sh'),False⟩"
      using NewInitOOM.hyps(3) by(auto simp: bconf_def)
    then show ?thesis using NewInitOOM.hyps(1) NewInitOOMReds[OF _ init NewInitOOM.hyps(4)] False
      NewInitOOM.hyps(5) by auto
  qed
next
  case (NewInitThrow sh C h l a s') show ?case
  proof(cases b)
    case True
    then obtain sfs where shC: "sh C = ⌊(sfs, Processing)⌋"
      using NewInitThrow.hyps(1) NewInitThrow.prems by(clarsimp simp: bconf_def initPD_def)
    then show ?thesis using NewInitThrow.hyps(2) init_ProcessingE by blast
  next
    case False
    then have init: "P ⊨ ⟨INIT C ([C],False) ← unit,(h, l, sh),b⟩ →* ⟨throw a,s',False⟩"
      using NewInitThrow.hyps(3) by(auto simp: bconf_def)
    then show ?thesis using NewInitThrow NewInitThrowReds[of "(h,l,sh)" C P a s'] False by auto
  qed
next
  case Cast then show ?case by(fastforce intro:CastRedsAddr)
next
  case CastNull then show ?case by(fastforce intro: CastRedsNull)
next
  case CastFail thus ?case by(fastforce intro!:CastRedsFail)
next
  case CastThrow thus ?case by(fastforce dest!:eval_final intro:CastRedsThrow)
next
  case Val then show ?case using exI[of _ b] by(simp add: bconf_def)
next
  case (BinOp e₁ s₀ v₁ s₁ e₂ v₂ s₂ bop v)
  show ?case
  proof(cases "val_of e₁")
    case None
    then have iconf: "iconf (shp s₀) e₁" using None BinOp.prems by auto
    have bconf: "P,shp s₀ ⊨_b (e₁,b) √" using None BinOp.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨Val v₁,s₁,False⟩" using iconf BinOp.hyps(2) by auto
    have binop: "P ⊨ ⟨e₁ «bop¬ e₂,s₀,b⟩ →* ⟨Val v₁ «bop¬ e₂,s₁,False⟩" by(rule BinOp1Reds[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf binop] None BinOp by auto
    have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨Val v₂,s₂,False⟩" using BinOp.hyps(4)[OF iconf2'] by auto
    then show ?thesis using BinOpRedsVal[OF b1 b2 BinOp.hyps(5)] by fast
  next
    case (Some a)
    then obtain b1 where b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨Val v₁,s₁,b1⟩"
      by (metis (no_types, lifting) BinOp.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have binop: "P ⊨ ⟨e₁ «bop¬ e₂,s₀,b⟩ →* ⟨Val v₁ «bop¬ e₂,s₁,b1⟩" by(rule BinOp1Reds[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf binop] BinOp by auto
    have bconf2: "P,shp s₀ ⊨_b (e₂,b) √" using BinOp.prems Some by simp
    then have "P,shp s₁ ⊨_b (e₂,b1) √" using Red_preserves_bconf[OF wwf binop BinOp.prems] by simp
    then have b2: "P ⊨ ⟨e₂,s₁,b1⟩ →* ⟨Val v₂,s₂,False⟩" using BinOp.hyps(4)[OF iconf2'] by auto
    then show ?thesis using BinOpRedsVal[OF b1 b2 BinOp.hyps(5)] by fast
  qed
next
  case (BinOpThrow1 e₁ s₀ e s₁ bop e₂) show ?case
  proof(cases "val_of e₁")
    case None
    then have "iconf (shp s₀) e₁" and "P,shp s₀ ⊨_b (e₁,b) √" using BinOpThrow1.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨throw e,s₁,False⟩" using BinOpThrow1.hyps(2) by auto
    then have "P ⊨ ⟨e₁ «bop¬ e₂,s₀,b⟩ →* ⟨throw e,s₁,False⟩"
      using BinOpThrow1 None by(auto dest!:eval_final simp: BinOpRedsThrow1[OF b1])
    then show ?thesis by fast
  next
    case (Some a)
    then show ?thesis using eval_final_same[OF BinOpThrow1.hyps(1)] val_of_spec[OF Some] by auto
  qed
next
  case (BinOpThrow2 e₁ s₀ v₁ s₁ e₂ e s₂ bop)
  show ?case
  proof(cases "val_of e₁")
    case None
    then have iconf: "iconf (shp s₀) e₁" using None BinOpThrow2.prems by auto
    have bconf: "P,shp s₀ ⊨_b (e₁,b) √" using None BinOpThrow2.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨Val v₁,s₁,False⟩" using iconf BinOpThrow2.hyps(2) by auto
    have binop: "P ⊨ ⟨e₁ «bop¬ e₂,s₀,b⟩ →* ⟨Val v₁ «bop¬ e₂,s₁,False⟩" by(rule BinOp1Reds[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf binop] None BinOpThrow2 by auto
    have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨throw e,s₂,False⟩" using BinOpThrow2.hyps(4)[OF iconf2'] by auto
    then show ?thesis using BinOpRedsThrow2[OF b1 b2] by fast
  next
    case (Some a)
    then obtain b1 where b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨Val v₁,s₁,b1⟩"
      by (metis (no_types, lifting) BinOpThrow2.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have binop: "P ⊨ ⟨e₁ «bop¬ e₂,s₀,b⟩ →* ⟨Val v₁ «bop¬ e₂,s₁,b1⟩" by(rule BinOp1Reds[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf binop] BinOpThrow2 by auto
    have bconf2: "P,shp s₀ ⊨_b (e₂,b) √" using BinOpThrow2.prems Some by simp
    then have "P,shp s₁ ⊨_b (e₂,b1) √" using Red_preserves_bconf[OF wwf binop BinOpThrow2.prems] by simp
    then have b2: "P ⊨ ⟨e₂,s₁,b1⟩ →* ⟨throw e,s₂,False⟩" using BinOpThrow2.hyps(4)[OF iconf2'] by auto
    then show ?thesis using BinOpRedsThrow2[OF b1 b2] by fast
  qed
next
  case Var thus ?case by(auto dest:RedVar simp: bconf_def)
next
  case LAss thus ?case by(auto dest: LAssRedsVal)
next
  case LAssThrow thus ?case by(auto dest!:eval_final dest: LAssRedsThrow)
next
  case FAcc thus ?case by(fastforce intro:FAccRedsVal)
next
  case FAccNull thus ?case by(auto dest:FAccRedsNull)
next
  case FAccThrow thus ?case by(auto dest!:eval_final dest:FAccRedsThrow)
next
  case FAccNone then show ?case by(fastforce intro: FAccRedsNone)
next
  case FAccStatic then show ?case by(fastforce intro: FAccRedsStatic)
next
  case SFAcc show ?case
  proof(cases b)
    case True then show ?thesis using RedSFAcc SFAcc.hyps by auto
  next
    case False then show ?thesis using SFAcc.hyps SFAccInitDoneReds[OF SFAcc.hyps(1)] by auto
  qed
next
  case (SFAccInit C F t D sh h l v' h' l' sh' sfs i v) show ?case
  proof(cases b)
    case True
    then obtain sfs where shC: "sh D = ⌊(sfs, Processing)⌋"
      using SFAccInit.hyps(2) SFAccInit.prems by(clarsimp simp: bconf_def initPD_def)
    then have s': "(h',l',sh') = (h,l,sh)" using SFAccInit.hyps(3) init_ProcessingE by clarsimp
    then show ?thesis using RedSFAcc SFAccInit.hyps True by auto
  next
    case False
    then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh),False⟩ →* ⟨Val v',(h', l', sh'),False⟩"
      using SFAccInit.hyps(4) by(auto simp: bconf_def)
    then show ?thesis using SFAccInit SFAccInitReds[OF _ _ init] False by auto
  qed
next
  case (SFAccInitThrow C F t D sh h l a s') show ?case
  proof(cases b)
    case True
    then obtain sfs where shC: "sh D = ⌊(sfs, Processing)⌋"
      using SFAccInitThrow.hyps(2) SFAccInitThrow.prems(2) by(clarsimp simp: bconf_def initPD_def)
    then show ?thesis using SFAccInitThrow.hyps(3) init_ProcessingE by blast
  next
    case False
    then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh),b⟩ →* ⟨throw a,s',False⟩"
      using SFAccInitThrow.hyps(4) by(auto simp: bconf_def)
    then show ?thesis using SFAccInitThrow SFAccInitThrowReds False by auto
  qed
next
  case SFAccNone then show ?case by(fastforce intro: SFAccRedsNone)
next
  case SFAccNonStatic then show ?case by(fastforce intro: SFAccRedsNonStatic)
next
  case (FAss e₁ s₀ a s₁ e₂ v h₂ l₂ sh₂ C fs F t D fs' h₂')
  show ?case
  proof(cases "val_of e₁")
    case None
    then have iconf: "iconf (shp s₀) e₁" using None FAss.prems by auto
    have bconf: "P,shp s₀ ⊨_b (e₁,b) √" using None FAss.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨addr a,s₁,False⟩" using iconf FAss.hyps(2) by auto
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨addr a∙F{D} := e₂,s₁,False⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] None FAss by auto
    have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using FAss.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsVal[OF b1 b2 FAss.hyps(6) FAss.hyps(5)[THEN sym]] FAss.hyps(7,8) by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨addr a,s₁,b1⟩"
      by (metis (no_types, lifting) FAss.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨addr a∙F{D} := e₂,s₁,b1⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] FAss by auto
    have bconf2: "P,shp s₀ ⊨_b (e₂,b) √" using FAss.prems Some by simp
    then have "P,shp s₁ ⊨_b (e₂,b1) √" using Red_preserves_bconf[OF wwf fass FAss.prems] by simp
    then have b2: "P ⊨ ⟨e₂,s₁,b1⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using FAss.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsVal[OF b1 b2] FAss.hyps(5)[THEN sym] FAss.hyps(6-8) by fast
  qed
next
  case (FAssNull e₁ s₀ s₁ e₂ v s₂ F D)
  show ?case
  proof(cases "val_of e₁")
    case None
    then have iconf: "iconf (shp s₀) e₁" using FAssNull.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e₁,b) √" using FAssNull.prems(2) None by simp
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨null,s₁,False⟩" using FAssNull.hyps(2)[OF iconf] by auto
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨null∙F{D} := e₂,s₁,False⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] None FAssNull by auto
    have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨Val v,s₂,False⟩" using FAssNull.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsNull[OF b1 b2] by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨null,s₁,b1⟩"
      by (metis (no_types, lifting) FAssNull.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨null∙F{D} := e₂,s₁,b1⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] FAssNull by auto
    have bconf2: "P,shp s₀ ⊨_b (e₂,b) √" using FAssNull.prems Some by simp
    then have "P,shp s₁ ⊨_b (e₂,b1) √" using Red_preserves_bconf[OF wwf fass FAssNull.prems] by simp
    then have b2: "P ⊨ ⟨e₂,s₁,b1⟩ →* ⟨Val v,s₂,False⟩" using FAssNull.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsNull[OF b1 b2] by fast
  qed
next
  case (FAssThrow1 e₁ s₀ e' s₁ F D e₂) show ?case
  proof(cases "val_of e₁")
    case None
    then have "iconf (shp s₀) e₁" and "P,shp s₀ ⊨_b (e₁,b) √" using FAssThrow1.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨throw e',s₁,False⟩" using FAssThrow1.hyps(2) by auto
    then have "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨throw e',s₁,False⟩"
      using FAssThrow1 None by(auto dest!:eval_final simp: FAssRedsThrow1[OF b1])
    then show ?thesis by fast
  next
    case (Some a)
    then show ?thesis using eval_final_same[OF FAssThrow1.hyps(1)] val_of_spec[OF Some] by auto
  qed
next
  case (FAssThrow2 e₁ s₀ v s₁ e₂ e' s₂ F D)
  show ?case
  proof(cases "val_of e₁")
    case None
    then have iconf: "iconf (shp s₀) e₁" using None FAssThrow2.prems by auto
    have bconf: "P,shp s₀ ⊨_b (e₁,b) √" using None FAssThrow2.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨Val v,s₁,False⟩" using iconf FAssThrow2.hyps(2) by auto
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨Val v∙F{D} := e₂,s₁,False⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] None FAssThrow2 by auto
    have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨throw e',s₂,False⟩" using FAssThrow2.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsThrow2[OF b1 b2] by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨Val v,s₁,b1⟩"
      by (metis (no_types, lifting) FAssThrow2.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨Val v∙F{D} := e₂,s₁,b1⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] FAssThrow2 by auto
    have bconf2: "P,shp s₀ ⊨_b (e₂,b) √" using FAssThrow2.prems Some by simp
    then have "P,shp s₁ ⊨_b (e₂,b1) √" using Red_preserves_bconf[OF wwf fass FAssThrow2.prems] by simp
    then have b2: "P ⊨ ⟨e₂,s₁,b1⟩ →* ⟨throw e',s₂,False⟩" using FAssThrow2.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsThrow2[OF b1 b2] by fast
  qed
next
  case (FAssNone e₁ s₀ a s₁ e₂ v h₂ l₂ sh₂ C fs F D)
  show ?case
  proof(cases "val_of e₁")
    case None
    then have iconf: "iconf (shp s₀) e₁" using None FAssNone.prems by auto
    have bconf: "P,shp s₀ ⊨_b (e₁,b) √" using None FAssNone.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨addr a,s₁,False⟩" using iconf FAssNone.hyps(2) by auto
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨addr a∙F{D} := e₂,s₁,False⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] None FAssNone by auto
    have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using FAssNone.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsNone[OF b1 b2 FAssNone.hyps(5,6)] by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨addr a,s₁,b1⟩"
      by (metis (no_types, lifting) FAssNone.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨addr a∙F{D} := e₂,s₁,b1⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] FAssNone by auto
    have bconf2: "P,shp s₀ ⊨_b (e₂,b) √" using FAssNone.prems Some by simp
    then have "P,shp s₁ ⊨_b (e₂,b1) √" using Red_preserves_bconf[OF wwf fass FAssNone.prems] by simp
    then have b2: "P ⊨ ⟨e₂,s₁,b1⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using FAssNone.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsNone[OF b1 b2 FAssNone.hyps(5,6)] by fast
  qed
next
  case (FAssStatic e₁ s₀ a s₁ e₂ v h₂ l₂ sh₂ C fs F t D)
  show ?case
  proof(cases "val_of e₁")
    case None
    then have iconf: "iconf (shp s₀) e₁" using None FAssStatic.prems by auto
    have bconf: "P,shp s₀ ⊨_b (e₁,b) √" using None FAssStatic.prems by auto
    then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨addr a,s₁,False⟩" using iconf FAssStatic.hyps(2) by auto
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨addr a∙F{D} := e₂,s₁,False⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] None FAssStatic by auto
    have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using FAssStatic.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsStatic[OF b1 b2 FAssStatic.hyps(5,6)] by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨addr a,s₁,b1⟩"
      by (metis (no_types, lifting) FAssStatic.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e₁∙F{D} := e₂,s₀,b⟩ →* ⟨addr a∙F{D} := e₂,s₁,b1⟩" by(rule FAssReds1[OF b1])
    then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf fass] FAssStatic by auto
    have bconf2: "P,shp s₀ ⊨_b (e₂,b) √" using FAssStatic.prems Some by simp
    then have "P,shp s₁ ⊨_b (e₂,b1) √" using Red_preserves_bconf[OF wwf fass FAssStatic.prems] by simp
    then have b2: "P ⊨ ⟨e₂,s₁,b1⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using FAssStatic.hyps(4)[OF iconf2'] by auto
    then show ?thesis using FAssRedsStatic[OF b1 b2 FAssStatic.hyps(5,6)] by fast
  qed
next
  case (SFAss e₂ s₀ v h₁ l₁ sh₁ C F t D sfs sfs' sh₁')
  show ?case
  proof(cases "val_of e₂")
    case None
    then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" using SFAss.prems(2) by simp
    then have b1: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₁, l₁, sh₁),False⟩" using SFAss by auto
    thus ?thesis using SFAssRedsVal[OF b1 SFAss.hyps(3,4)] SFAss.hyps(5,6) by fast
  next
    case (Some a)
    then obtain b1 where b1: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₁, l₁, sh₁),b1⟩"
      by (metis (no_types, lifting) SFAss.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    thus ?thesis using SFAssRedsVal[OF b1 SFAss.hyps(3,4)] SFAss.hyps(5,6) by fast
  qed
next
  case (SFAssInit e₂ s₀ v h₁ l₁ sh₁ C F t D v' h' l' sh' sfs i sfs' sh'')
  then have iconf: "iconf (shp s₀) e₂" by simp
  show ?case
  proof(cases "val_of e₂")
    case None
    then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" using SFAssInit.prems(2) by simp
    then have reds: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₁, l₁, sh₁),False⟩"
      using SFAssInit.hyps(2)[OF iconf bconf] by auto
    then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨Val v',(h', l', sh'),False⟩"
      using SFAssInit.hyps(6) by(auto simp: bconf_def)
    then show ?thesis using SFAssInit SFAssInitReds[OF reds SFAssInit.hyps(3) _ init] by auto
  next
    case (Some v2) show ?thesis
    proof(cases b)
      case False
      then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" by(simp add: bconf_def)
      then have reds: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₁, l₁, sh₁),False⟩"
        using SFAssInit.hyps(2)[OF iconf bconf] by auto
      then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨Val v',(h', l', sh'),False⟩"
        using SFAssInit.hyps(6) by(auto simp: bconf_def)
      then show ?thesis using SFAssInit SFAssInitReds[OF reds SFAssInit.hyps(3) _ init] by auto
    next
      case True
      have e₂: "e₂ = Val v2" using val_of_spec[OF Some] by simp
      then have vs: "v2 = v ∧ s₀ = (h₁, l₁, sh₁)" using eval_final_same[OF SFAssInit.hyps(1)] by simp
      then obtain sfs where shC: "sh₁ D = ⌊(sfs, Processing)⌋"
        using SFAssInit.hyps(3,4) SFAssInit.prems(2) Some True
          by(cases e₂, auto simp: bconf_def initPD_def dest: sees_method_fun)
      then have s': "(h',l',sh') = (h₁, l₁, sh₁)" using SFAssInit.hyps(5) init_ProcessingE by clarsimp
      then show ?thesis using SFAssInit.hyps(3,7-9) True e₂ red_reds.RedSFAss vs by auto
    qed
  qed
next
  case (SFAssInitThrow e₂ s₀ v h₁ l₁ sh₁ C F t D a s')
  then have iconf: "iconf (shp s₀) e₂" by simp
  show ?case
  proof(cases "val_of e₂")
    case None
    then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" using SFAssInitThrow.prems(2) by simp
    then have reds: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₁, l₁, sh₁),False⟩"
      using SFAssInitThrow.hyps(2)[OF iconf bconf] by auto
    then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨throw a,s',False⟩"
      using SFAssInitThrow.hyps(6) by(auto simp: bconf_def)
    then show ?thesis using SFAssInitThrow SFAssInitThrowReds[OF reds _ _ init] by auto
  next
    case (Some v2) show ?thesis
    proof(cases b)
      case False
      then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" by(simp add: bconf_def)
      then have reds: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₁, l₁, sh₁),False⟩"
        using SFAssInitThrow.hyps(2)[OF iconf bconf] by auto
      then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨throw a,s',False⟩"
        using SFAssInitThrow.hyps(6) by(auto simp: bconf_def)
      then show ?thesis using SFAssInitThrow SFAssInitThrowReds[OF reds _ _ init] by auto
    next
      case True
      obtain v2 where e₂: "e₂ = Val v2" using val_of_spec[OF Some] by simp
      then have vs: "v2 = v ∧ s₀ = (h₁, l₁, sh₁)"
        using eval_final_same[OF SFAssInitThrow.hyps(1)] by simp
      then obtain sfs where shC: "sh₁ D = ⌊(sfs, Processing)⌋"
       using SFAssInitThrow.hyps(4) SFAssInitThrow.prems(2) Some True
        by(cases e₂, auto simp: bconf_def initPD_def dest: sees_method_fun)
      then show ?thesis using SFAssInitThrow.hyps(5) init_ProcessingE by blast
    qed
  qed
next
  case (SFAssThrow e₂ s₀ e' s₂ C F D)
  show ?case
  proof(cases "val_of e₂")
    case None
    then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" using SFAssThrow.prems(2) None by simp
    then have b1: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨throw e',s₂,False⟩" using SFAssThrow by auto
    thus ?thesis using SFAssRedsThrow[OF b1] by fast
  next
    case (Some a)
    then show ?thesis using eval_final_same[OF SFAssThrow.hyps(1)] val_of_spec[OF Some] by auto
  qed
next
  case (SFAssNone e₂ s₀ v h₂ l₂ sh₂ C F D)
  show ?case
  proof(cases "val_of e₂")
    case None
    then have iconf: "iconf (shp s₀) e₂" using SFAssNone by simp
    then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" using SFAssNone.prems(2) None by simp
    then have b1: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using SFAssNone.hyps(2) iconf by auto
    thus ?thesis using SFAssRedsNone[OF b1 SFAssNone.hyps(3)] by fast
  next
    case (Some a)
    then obtain b1 where b1: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₂, l₂, sh₂),b1⟩"
      by (metis (no_types, lifting) SFAssNone.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    thus ?thesis using SFAssRedsNone[OF b1 SFAssNone.hyps(3)] by fast
  qed
next
  case (SFAssNonStatic e₂ s₀ v h₂ l₂ sh₂ C F t D) show ?case
  proof(cases "val_of e₂")
    case None
    then have iconf: "iconf (shp s₀) e₂" using SFAssNonStatic by simp
    then have bconf: "P,shp s₀ ⊨_b (e₂,b) √" using SFAssNonStatic.prems(2) None by simp
    then have b1: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₂, l₂, sh₂),False⟩" using SFAssNonStatic.hyps(2) iconf by auto
    thus ?thesis using SFAssRedsNonStatic[OF b1 SFAssNonStatic.hyps(3)] by fast
  next
    case (Some a)
    then obtain b' where b1: "P ⊨ ⟨e₂,s₀,b⟩ →* ⟨Val v,(h₂, l₂, sh₂),b'⟩"
      by (metis (no_types, lifting) SFAssNonStatic.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    thus ?thesis using SFAssRedsNonStatic[OF b1 SFAssNonStatic.hyps(3)] by fast
  qed
next
  case (CallObjThrow e s₀ e' s₁ M ps) show ?case
  proof(cases "val_of e")
    case None
    then have "iconf (shp s₀) e" and "P,shp s₀ ⊨_b (e,b) √" using CallObjThrow.prems by auto
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨throw e',s₁,False⟩" using CallObjThrow.hyps(2) by auto
    then have "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨throw e',s₁,False⟩"
      using CallObjThrow None by(auto dest!:eval_final simp: CallRedsThrowObj[OF b1])
    then show ?thesis by fast
  next
    case (Some a)
    then show ?thesis using eval_final_same[OF CallObjThrow.hyps(1)] val_of_spec[OF Some] by auto
  qed
next
  case (CallNull e s₀ s₁ ps vs s₂ M) show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s₀) e" using CallNull.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e,b) √" using CallNull.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨null,s₁,False⟩" using CallNull.hyps(2)[OF iconf] by auto
    have call: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨null∙M(ps),s₁,False⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf call] None CallNull by auto
    have "P,shp s₁ ⊨_b (ps,False) √" by(simp add: bconfs_def)
    then have b2: "P ⊨ ⟨ps,s₁,False⟩ [→]* ⟨map Val vs,s₂,False⟩" using CallNull.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsNull[OF b1 b2] by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨null,s₁,b1⟩"
      by (metis (no_types, lifting) CallNull.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨null∙M(ps),s₁,b1⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf fass] CallNull by auto
    have bconf2: "P,shp s₀ ⊨_b (ps,b) √" using CallNull.prems Some by simp
    then have "P,shp s₁ ⊨_b (ps,b1) √" using Red_preserves_bconf[OF wwf fass CallNull.prems] by simp
    then have b2: "P ⊨ ⟨ps,s₁,b1⟩ [→]* ⟨map Val vs,s₂,False⟩" using CallNull.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsNull[OF b1 b2] by fast
  qed
next
  case (CallParamsThrow e s₀ v s₁ es vs ex es' s₂ M) show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s₀) e" using CallParamsThrow.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e,b) √" using CallParamsThrow.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨Val v,s₁,False⟩" using CallParamsThrow.hyps(2)[OF iconf] by auto
    have call: "P ⊨ ⟨e∙M(es),s₀,b⟩ →* ⟨Val v∙M(es),s₁,False⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) es" using Red_preserves_iconf[OF wwf call] None CallParamsThrow by auto
    have "P,shp s₁ ⊨_b (es,False) √" by(simp add: bconfs_def)
    then have b2: "P ⊨ ⟨es,s₁,False⟩ [→]* ⟨map Val vs @ throw ex # es',s₂,False⟩"
      using CallParamsThrow.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsThrowParams[OF b1 b2] by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨Val v,s₁,b1⟩"
      by (metis (no_types, lifting) CallParamsThrow.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e∙M(es),s₀,b⟩ →* ⟨Val v∙M(es),s₁,b1⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) es" using Red_preserves_iconf[OF wwf fass] CallParamsThrow by auto
    have bconf2: "P,shp s₀ ⊨_b (es,b) √" using CallParamsThrow.prems Some by simp
    then have "P,shp s₁ ⊨_b (es,b1) √" using Red_preserves_bconf[OF wwf fass CallParamsThrow.prems] by simp
    then have b2: "P ⊨ ⟨es,s₁,b1⟩ [→]* ⟨map Val vs @ throw ex # es',s₂,False⟩"
      using CallParamsThrow.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsThrowParams[OF b1 b2] by fast
  qed
next
  case (CallNone e s₀ a s₁ ps vs h₂ l₂ sh₂ C fs M) show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s₀) e" using CallNone.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e,b) √" using CallNone.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨addr a,s₁,False⟩" using CallNone.hyps(2)[OF iconf] by auto
    have call: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨addr a∙M(ps),s₁,False⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf call] None CallNone by auto
    have "P,shp s₁ ⊨_b (ps,False) √" by(simp add: bconfs_def)
    then have b2: "P ⊨ ⟨ps,s₁,False⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),False⟩"
      using CallNone.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsNone[OF b1 b2 _ CallNone.hyps(6)] CallNone.hyps(5) by fastforce
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨addr a,s₁,b1⟩"
      by (metis (no_types, lifting) CallNone.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fass: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨addr a∙M(ps),s₁,b1⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf fass] CallNone by auto
    have bconf2: "P,shp s₀ ⊨_b (ps,b) √" using CallNone.prems Some by simp
    then have "P,shp s₁ ⊨_b (ps,b1) √" using Red_preserves_bconf[OF wwf fass CallNone.prems] by simp
    then have b2: "P ⊨ ⟨ps,s₁,b1⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),False⟩"
      using CallNone.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsNone[OF b1 b2 _ CallNone.hyps(6)] CallNone.hyps(5) by fastforce
  qed
next
  case (CallStatic e s₀ a s₁ ps vs h₂ l₂ sh₂ C fs M Ts T m D) show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s₀) e" using CallStatic.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e,b) √" using CallStatic.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨addr a,s₁,False⟩" using CallStatic.hyps(2)[OF iconf] by auto
    have call: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨addr a∙M(ps),s₁,False⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf call] None CallStatic by auto
    have "P,shp s₁ ⊨_b (ps,False) √" by(simp add: bconfs_def)
    then have b2: "P ⊨ ⟨ps,s₁,False⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),False⟩"
      using CallStatic.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsStatic[OF b1 b2 _ CallStatic.hyps(6)] CallStatic.hyps(5) by fastforce
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨addr a,s₁,b1⟩"
      by (metis (no_types, lifting) CallStatic.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have call: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨addr a∙M(ps),s₁,b1⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf call] CallStatic by auto
    have bconf2: "P,shp s₀ ⊨_b (ps,b) √" using CallStatic.prems Some by simp
    then have "P,shp s₁ ⊨_b (ps,b1) √" using Red_preserves_bconf[OF wwf call CallStatic.prems] by simp
    then have b2: "P ⊨ ⟨ps,s₁,b1⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),False⟩"
      using CallStatic.hyps(4)[OF iconf2'] by auto
    then show ?thesis using CallRedsStatic[OF b1 b2 _ CallStatic.hyps(6)] CallStatic.hyps(5) by fastforce
  qed
next
  case (Call e s₀ a s₁ ps vs h₂ l₂ sh₂ C fs M Ts T pns body D l₂' e' h₃ l₃ sh₃) show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s₀) e" using Call.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e,b) √" using Call.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨addr a,s₁,False⟩" using Call.hyps(2)[OF iconf] by auto
    have call: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨addr a∙M(ps),s₁,False⟩" by(rule CallRedsObj[OF b1])
    then have iconf2: "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf call] None Call by auto
    have "P,shp s₁ ⊨_b (ps,False) √" by(simp add: bconfs_def)
    then have b2: "P ⊨ ⟨ps,s₁,False⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),False⟩"
      using Call.hyps(4)[OF iconf2] by simp
    have iconf3: "iconf (shp (h₂, l₂', sh₂)) body"
      by(rule nsub_RI_iconf[OF sees_wwf_nsub_RI[OF wwf Call.hyps(6)]])
    have "P,shp (h₂, l₂', sh₂) ⊨_b (body,False) √" by(simp add: bconf_def)
    then have b3: "P ⊨ ⟨body,(h₂, l₂', sh₂),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
      using Call.hyps(10)[OF iconf3] by simp
    show ?thesis by(rule CallRedsFinal[OF wwf b1 b2 Call.hyps(5-8) b3 eval_final[OF Call.hyps(9)]])
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨addr a,s₁,b1⟩"
      by (metis (no_types, lifting) Call.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have call: "P ⊨ ⟨e∙M(ps),s₀,b⟩ →* ⟨addr a∙M(ps),s₁,b1⟩" by(rule CallRedsObj[OF b1])
    then have iconf2': "iconfs (shp s₁) ps" using Red_preserves_iconf[OF wwf call] Call by auto
    have bconf2: "P,shp s₀ ⊨_b (ps,b) √" using Call.prems Some by simp
    then have "P,shp s₁ ⊨_b (ps,b1) √" using Red_preserves_bconf[OF wwf call Call.prems] by simp
    then have b2: "P ⊨ ⟨ps,s₁,b1⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),False⟩"
      using Call.hyps(4)[OF iconf2'] by auto
    have iconf3: "iconf (shp (h₂, l₂', sh₂)) body"
      by(rule nsub_RI_iconf[OF sees_wwf_nsub_RI[OF wwf Call.hyps(6)]])
    have "P,shp (h₂, l₂', sh₂) ⊨_b (body,False) √" by(simp add: bconf_def)
    then have b3: "P ⊨ ⟨body,(h₂, l₂', sh₂),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
      using Call.hyps(10)[OF iconf3] by simp
    show ?thesis by(rule CallRedsFinal[OF wwf b1 b2 Call.hyps(5-8) b3 eval_final[OF Call.hyps(9)]])
  qed
next
  case (SCallParamsThrow es s₀ vs ex es' s₂ C M) show ?case
  proof(cases "map_vals_of es")
    case None
    then have iconf: "iconfs (shp s₀) es" using SCallParamsThrow.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (es,b) √" using SCallParamsThrow.prems(2) None by simp
    then have b1: "P ⊨ ⟨es,s₀,b⟩ [→]* ⟨map Val vs @ throw ex # es',s₂,False⟩"
      using SCallParamsThrow.hyps(2)[OF iconf] by simp
    show ?thesis using SCallRedsThrowParams[OF b1] by simp
  next
    case (Some vs')
    then have "es = map Val vs'" by(rule map_vals_of_spec)
    then show ?thesis using evals_finals_same[OF _ SCallParamsThrow.hyps(1)] map_Val_nthrow_neq
      by auto
  qed
next
  case (SCallNone ps s₀ vs s₂ C M) show ?case
  proof(cases "map_vals_of ps")
    case None
    then have iconf: "iconfs (shp s₀) ps" using SCallNone.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (ps,b) √" using SCallNone.prems(2) None by simp
    then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,s₂,False⟩" using SCallNone.hyps(2)[OF iconf] by auto
    then show ?thesis using SCallRedsNone[OF b1 SCallNone.hyps(3)] SCallNone.hyps(1) by simp
  next
    case (Some vs')
    then have ps: "ps = map Val vs'" by(rule map_vals_of_spec)
    then have s₀: "s₀ = s₂" using SCallNone.hyps(1) evals_finals_same by blast
    then show ?thesis using RedSCallNone[OF SCallNone.hyps(3)] ps by(cases s₂, auto)
  qed
next
  case (SCallNonStatic ps s₀ vs s₂ C M Ts T m D) show ?case
  proof(cases "map_vals_of ps")
    case None
    then have iconf: "iconfs (shp s₀) ps" using SCallNonStatic.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (ps,b) √" using SCallNonStatic.prems(2) None by simp
    then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,s₂,False⟩" using SCallNonStatic.hyps(2)[OF iconf] by auto
    then show ?thesis using SCallRedsNonStatic[OF b1 SCallNonStatic.hyps(3)] SCallNonStatic.hyps(1) by simp
  next
    case (Some vs')
    then have ps: "ps = map Val vs'" by(rule map_vals_of_spec)
    then have s₀: "s₀ = s₂" using SCallNonStatic.hyps(1) evals_finals_same by blast
    then show ?thesis using RedSCallNonStatic[OF SCallNonStatic.hyps(3)] ps by(cases s₂, auto)
  qed
next
  case (SCallInitThrow ps s₀ vs h₁ l₁ sh₁ C M Ts T pns body D a s') show ?case
  proof(cases "map_vals_of ps")
    case None
    then have iconf: "iconfs (shp s₀) ps" using SCallInitThrow.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (ps,b) √" using SCallInitThrow.prems(2) None by simp
    then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,(h₁, l₁, sh₁),False⟩"
      using SCallInitThrow.hyps(2)[OF iconf] by auto
    have bconf2: "P,shp (h₁, l₁, sh₁) ⊨_b (INIT D ([D],False) ← unit,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨throw a,s',False⟩"
      using SCallInitThrow.hyps(7) by auto
    then show ?thesis using SCallInitThrowReds[OF wwf b1 SCallInitThrow.hyps(3-5)]
      by(cases s', auto)
  next
    case (Some vs')
    have ps: "ps = map Val vs'" by(rule map_vals_of_spec[OF Some])
    then have vs: "vs = vs' ∧ s₀ = (h₁, l₁, sh₁)"
      using evals_finals_same[OF _ SCallInitThrow.hyps(1)] map_Val_eq by auto
    show ?thesis
    proof(cases b)
      case True
      obtain sfs where shC: "sh₁ D = ⌊(sfs, Processing)⌋"
        using SCallInitThrow.hyps(3,4) SCallInitThrow.prems(2) True Some vs
          by(auto simp: bconf_def initPD_def dest: sees_method_fun)
      then show ?thesis using init_ProcessingE[OF _ SCallInitThrow.hyps(6)] by blast
    next
      case False
      then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,(h₁, l₁, sh₁),False⟩" using ps vs by simp
      have bconf2: "P,shp (h₁, l₁, sh₁) ⊨_b (INIT D ([D],False) ← unit,False) √" by(simp add: bconf_def)
      then have b2: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨throw a,s',False⟩"
        using SCallInitThrow.hyps(7) by auto
      then show ?thesis using SCallInitThrowReds[OF wwf b1 SCallInitThrow.hyps(3-5)] by(cases s', auto)
    qed
  qed
next
  case (SCallInit ps s₀ vs h₁ l₁ sh₁ C M Ts T pns body D v' h₂ l₂ sh₂ l₂' e' h₃ l₃ sh₃) show ?case
  proof(cases "map_vals_of ps")
    case None
    then have iconf: "iconfs (shp s₀) ps" using SCallInit.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (ps,b) √" using SCallInit.prems(2) None by simp
    then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,(h₁, l₁, sh₁),False⟩"
      using SCallInit.hyps(2)[OF iconf] by auto
    have bconf2: "P,shp (h₁, l₁, sh₁) ⊨_b (INIT D ([D],False) ← unit,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨Val v',(h₂, l₂, sh₂),False⟩"
      using SCallInit.hyps(7) by auto
    have iconf3: "iconf (shp (h₂, l₂', sh₂)) body"
      by(rule nsub_RI_iconf[OF sees_wwf_nsub_RI[OF wwf SCallInit.hyps(3)]])
    have "P,shp (h₂, l₂', sh₂) ⊨_b (body,False) √" by(simp add: bconf_def)
    then have b3: "P ⊨ ⟨body,(h₂, l₂', sh₂),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
      using SCallInit.hyps(11)[OF iconf3] by simp
    show ?thesis by(rule SCallInitReds[OF wwf b1 SCallInit.hyps(3-5) b2 SCallInit.hyps(8-9)
                           b3 eval_final[OF SCallInit.hyps(10)]])
  next
    case (Some vs')
    then have ps: "ps = map Val vs'" by(rule map_vals_of_spec)
    then have vs: "vs = vs' ∧ s₀ = (h₁, l₁, sh₁)"
      using evals_finals_same[OF _ SCallInit.hyps(1)] map_Val_eq by auto
    show ?thesis
    proof(cases b)
      case True
      then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,(h₁, l₁, sh₁),b⟩" using ps vs by simp
      obtain sfs where shC: "sh₁ D = ⌊(sfs, Processing)⌋"
        using SCallInit.hyps(3,4) SCallInit.prems(2) True Some vs
          by(auto simp: bconf_def initPD_def dest: sees_method_fun)
      then have s': "(h₁, l₁, sh₁) = (h₂, l₂, sh₂)" using init_ProcessingE[OF _ SCallInit.hyps(6)] by simp
      have iconf3: "iconf (shp (h₂, l₂', sh₂)) body"
        by(rule nsub_RI_iconf[OF sees_wwf_nsub_RI[OF wwf SCallInit.hyps(3)]])
      have "P,shp (h₂, l₂', sh₂) ⊨_b (body,False) √" by(simp add: bconf_def)
      then have b3: "P ⊨ ⟨body,(h₂, l₂', sh₂),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
        using SCallInit.hyps(11)[OF iconf3] by simp
      then have b3': "P ⊨ ⟨body,(h₁, l₂', sh₁),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
        using s' by simp
      then show ?thesis using SCallInitProcessingReds[OF wwf b1 SCallInit.hyps(3) shC
                           SCallInit.hyps(8-9) b3' eval_final[OF SCallInit.hyps(10)]] s' by simp
    next
      case False
      then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,(h₁, l₁, sh₁),False⟩" using ps vs by simp
      have bconf2: "P,shp (h₁, l₁, sh₁) ⊨_b (INIT D ([D],False) ← unit,False) √" by(simp add: bconf_def)
      then have b2: "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁),False⟩ →* ⟨Val v',(h₂, l₂, sh₂),False⟩"
        using SCallInit.hyps(7) by auto
      have iconf3: "iconf (shp (h₂, l₂', sh₂)) body"
        by(rule nsub_RI_iconf[OF sees_wwf_nsub_RI[OF wwf SCallInit.hyps(3)]])
      have "P,shp (h₂, l₂', sh₂) ⊨_b (body,False) √" by(simp add: bconf_def)
      then have b3: "P ⊨ ⟨body,(h₂, l₂', sh₂),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
        using SCallInit.hyps(11)[OF iconf3] by simp
      show ?thesis by(rule SCallInitReds[OF wwf b1 SCallInit.hyps(3-5) b2 SCallInit.hyps(8-9)
                             b3 eval_final[OF SCallInit.hyps(10)]])
    qed
  qed
next
  case (SCall ps s₀ vs h₂ l₂ sh₂ C M Ts T pns body D sfs l₂' e' h₃ l₃ sh₃) show ?case
  proof(cases "map_vals_of ps")
    case None
    then have iconf: "iconfs (shp s₀) ps" using SCall.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (ps,b) √" using SCall.prems(2) None by simp
    then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),False⟩"
      using SCall.hyps(2)[OF iconf] by auto
    have iconf3: "iconf (shp (h₂, l₂', sh₂)) body"
      by(rule nsub_RI_iconf[OF sees_wwf_nsub_RI[OF wwf SCall.hyps(3)]])
    have "P,shp (h₂, l₂', sh₂) ⊨_b (body,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨body,(h₂, l₂', sh₂),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
      using SCall.hyps(8)[OF iconf3] by simp
    show ?thesis by(rule SCallRedsFinal[OF wwf b1 SCall.hyps(3-6) b2 eval_final[OF SCall.hyps(7)]])
  next
    case (Some vs')
    then have ps: "ps = map Val vs'" by(rule map_vals_of_spec)
    then have vs: "vs = vs' ∧ s₀ = (h₂, l₂, sh₂)"
      using evals_finals_same[OF _ SCall.hyps(1)] map_Val_eq by auto
    then have b1: "P ⊨ ⟨ps,s₀,b⟩ [→]* ⟨map Val vs,(h₂, l₂, sh₂),b⟩" using ps by simp
    have iconf3: "iconf (shp (h₂, l₂', sh₂)) body"
      by(rule nsub_RI_iconf[OF sees_wwf_nsub_RI[OF wwf SCall.hyps(3)]])
    have "P,shp (h₂, l₂', sh₂) ⊨_b (body,False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨body,(h₂, l₂', sh₂),False⟩ →* ⟨e',(h₃, l₃, sh₃),False⟩"
      using SCall.hyps(8)[OF iconf3] by simp
    show ?thesis by(rule SCallRedsFinal[OF wwf b1 SCall.hyps(3-6) b2 eval_final[OF SCall.hyps(7)]])
  qed
next
  case (Block e₀ h₀ l₀ V sh₀ e₁ h₁ l₁ sh₁ T)
  have iconf: "iconf (shp (h₀, l₀(V := None), sh₀)) e₀"
    using Block.prems(1) by (auto simp: assigned_def)
  have bconf: "P,shp (h₀, l₀(V := None), sh₀) ⊨_b (e₀,b) √" using Block.prems(2)
    by(auto simp: bconf_def)
  then have b': "P ⊨ ⟨e₀,(h₀, l₀(V := None), sh₀),b⟩ →* ⟨e₁,(h₁, l₁, sh₁),False⟩"
    using Block.hyps(2)[OF iconf] by auto
  have fin: "final e₁" using Block by(auto dest: eval_final)
  thus ?case using BlockRedsFinal[OF b' fin] by simp
next
  case (Seq e₀ s₀ v s₁ e₁ e₂ s₂)
  then have iconf: "iconf (shp s₀) e₀" using Seq.prems(1)
    by(auto dest: val_of_spec lass_val_of_spec)
  have b1: "∃b1. P ⊨ ⟨e₀,s₀,b⟩ →* ⟨Val v,s₁,b1⟩"
  proof(cases "val_of e₀")
    case None show ?thesis
    proof(cases "lass_val_of e₀")
      case lNone:None
      then have bconf: "P,shp s₀ ⊨_b (e₀,b) √" using Seq.prems(2) None by simp
      then have "P ⊨ ⟨e₀,s₀,b⟩ →* ⟨Val v,s₁,False⟩" using iconf Seq.hyps(2) by auto
      then show ?thesis by fast
    next
      case (Some p)
      obtain V' v' where p: "p = (V',v')" and e₀: "e₀ = V':=Val v'"
        using lass_val_of_spec[OF Some] by(cases p, auto)
      obtain h l sh h' l' sh' where s₀: "s₀ = (h,l,sh)" and s₁: "s₁ = (h',l',sh')" by(cases s₀, cases s₁)
      then have eval: "P ⊨ ⟨e₀,(h,l,sh)⟩ ==> ⟨Val v,(h',l',sh')⟩" using Seq.hyps(1) by simp
      then have s₁': "Val v = unit ∧ h' = h ∧ l' = l(V' ↦ v') ∧ sh' = sh"
        using lass_val_of_eval[OF Some eval] p e₀ by simp
      then have "P ⊨ ⟨e₀,s₀,b⟩ → ⟨Val v,s₁,b⟩" using e₀ s₀ s₁ by(auto intro: RedLAss)
      then show ?thesis by auto
    qed
  next
    case (Some a)
    then have "e₀ = Val v" and "s₀ = s₁" using Seq.hyps(1) eval_cases(3) val_of_spec by blast+
    then show ?thesis using Seq by auto
  qed
  then obtain b1 where b1': "P ⊨ ⟨e₀,s₀,b⟩ →* ⟨Val v,s₁,b1⟩" by clarsimp
  have seq: "P ⊨ ⟨e₀;;e₁,s₀,b⟩ →* ⟨Val v;;e₁,s₁,b1⟩" by(rule SeqReds[OF b1'])
  then have iconf2: "iconf (shp s₁) e₁" using Red_preserves_iconf[OF wwf seq] Seq nsub_RI_iconf
    by auto
  have "P,shp s₁ ⊨_b (Val v;; e₁,b1) √" by(rule Red_preserves_bconf[OF wwf seq Seq.prems])
  then have bconf2: "P,shp s₁ ⊨_b (e₁,b1) √" by simp
  have b2: "P ⊨ ⟨e₁,s₁,b1⟩ →* ⟨e₂,s₂,False⟩" by(rule Seq.hyps(4)[OF iconf2 bconf2])
  then show ?case using SeqReds2[OF b1' b2] by fast
next
  case (SeqThrow e₀ s₀ a s₁ e₁ b)
  have notVal: "val_of e₀ = None" "lass_val_of e₀ = None"
    using SeqThrow.hyps(1) eval_throw_nonVal eval_throw_nonLAss by auto
  thus ?case using SeqThrow notVal by(auto dest!:eval_final dest: SeqRedsThrow)
next
  case (CondT e s₀ s₁ e₁ e' s₂ e₂)
  then have iconf: "iconf (shp s₀) e" using CondT.prems(1) by auto
  have bconf: "P,shp s₀ ⊨_b (e,b) √" using CondT.prems(2) by auto
  then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨true,s₁,False⟩" using iconf CondT.hyps(2) by auto
  have cond: "P ⊨ ⟨if (e) e₁ else e₂,s₀,b⟩ →* ⟨if (true) e₁ else e₂,s₁,False⟩" by(rule CondReds[OF b1])
  then have iconf2': "iconf (shp s₁) e₁" using Red_preserves_iconf[OF wwf cond] CondT nsub_RI_iconf
    by auto
  have "P,shp s₁ ⊨_b (e₁,False) √" by(simp add: bconf_def)
  then have b2: "P ⊨ ⟨e₁,s₁,False⟩ →* ⟨e',s₂,False⟩" using CondT.hyps(4)[OF iconf2'] by auto
  then show ?case using CondReds2T[OF b1 b2] by fast
next
  case (CondF e s₀ s₁ e₂ e' s₂ e₁)
  then have iconf: "iconf (shp s₀) e" using CondF.prems(1) by auto
  have bconf: "P,shp s₀ ⊨_b (e,b) √" using CondF.prems(2) by auto
  then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨false,s₁,False⟩" using iconf CondF.hyps(2) by auto
  have cond: "P ⊨ ⟨if (e) e₁ else e₂,s₀,b⟩ →* ⟨if (false) e₁ else e₂,s₁,False⟩" by(rule CondReds[OF b1])
  then have iconf2': "iconf (shp s₁) e₂" using Red_preserves_iconf[OF wwf cond] CondF nsub_RI_iconf
    by auto
  have "P,shp s₁ ⊨_b (e₂,False) √" by(simp add: bconf_def)
  then have b2: "P ⊨ ⟨e₂,s₁,False⟩ →* ⟨e',s₂,False⟩" using CondF.hyps(4)[OF iconf2'] by auto
  then show ?case using CondReds2F[OF b1 b2] by fast
next
  case CondThrow thus ?case by(auto dest!:eval_final dest:CondRedsThrow)
next
  case (WhileF e s₀ s₁ c)
  then have iconf: "iconf (shp s₀) e" using nsub_RI_iconf by auto
  then have bconf: "P,shp s₀ ⊨_b (e,b) √" using WhileF.prems(2) by(simp add: bconf_def)
  then have b': "P ⊨ ⟨e,s₀,b⟩ →* ⟨false,s₁,False⟩" using WhileF.hyps(2) iconf by auto
  thus ?case using WhileFReds[OF b'] by fast
next
  case (WhileT e s₀ s₁ c v₁ s₂ e₃ s₃)
  then have iconf: "iconf (shp s₀) e" using nsub_RI_iconf by auto
  then have bconf: "P,shp s₀ ⊨_b (e,b) √" using WhileT.prems(2) by(simp add: bconf_def)
  then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨true,s₁,False⟩" using WhileT.hyps(2) iconf by auto
  have iconf2: "iconf (shp s₁) c" using WhileT.prems(1) nsub_RI_iconf by auto
  have bconf2: "P,shp s₁ ⊨_b (c,False) √" by(simp add: bconf_def)
  then have b2: "P ⊨ ⟨c,s₁,False⟩ →* ⟨Val v₁,s₂,False⟩" using WhileT.hyps(4) iconf2 by auto
  have iconf3: "iconf (shp s₂) (while (e) c)" using WhileT.prems(1) by auto
  have "P,shp s₂ ⊨_b (while (e) c,False) √" by(simp add: bconf_def)
  then have b3: "P ⊨ ⟨while (e) c,s₂,False⟩ →* ⟨e₃,s₃,False⟩" using WhileT.hyps(6) iconf3 by auto
  show ?case using WhileTReds[OF b1 b2 b3] by fast
next
  case WhileCondThrow thus ?case
    by (metis (no_types, lifting) WhileRedsThrow iconf.simps(16) bconf_While bconf_def nsub_RI_iconf)
next
  case (WhileBodyThrow e s₀ s₁ c e' s₂)
  then have iconf: "iconf (shp s₀) e" using nsub_RI_iconf by auto
  then have bconf: "P,shp s₀ ⊨_b (e,b) √" using WhileBodyThrow.prems(2) by(simp add: bconf_def)
  then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨true,s₁,False⟩" using WhileBodyThrow.hyps(2) iconf by auto
  have iconf2: "iconf (shp s₁) c" using WhileBodyThrow.prems(1) nsub_RI_iconf by auto
  have bconf2: "P,shp s₁ ⊨_b (c,False) √" by(simp add: bconf_def)
  then have b2: "P ⊨ ⟨c,s₁,False⟩ →* ⟨throw e',s₂,False⟩" using WhileBodyThrow.hyps(4) iconf2 by auto
  show ?case using WhileTRedsThrow[OF b1 b2] by fast
next
  case Throw thus ?case by (meson ThrowReds iconf.simps(17) bconf_Throw)
next
  case ThrowNull thus ?case by (meson ThrowRedsNull iconf.simps(17) bconf_Throw)
next
  case ThrowThrow thus ?case by (meson ThrowRedsThrow iconf.simps(17) bconf_Throw)
next
  case Try thus ?case by (meson TryRedsVal iconf.simps(18) bconf_Try)
next
  case (TryCatch e₁ s₀ a h₁ l₁ sh₁ D fs C e₂ V e₂' h₂ l₂ sh₂)
  then have b1: "P ⊨ ⟨e₁,s₀,b⟩ →* ⟨Throw a,(h₁, l₁, sh₁),False⟩" by auto
  have Try: "P ⊨ ⟨try e₁ catch(C V) e₂,s₀,b⟩ →* ⟨try (Throw a) catch(C V) e₂,(h₁, l₁, sh₁),False⟩"
    by(rule TryReds[OF b1])
  have iconf: "iconf sh₁ e₂" using Red_preserves_iconf[OF wwf Try] TryCatch nsub_RI_iconf
    by auto
  have bconf: "P,shp (h₁, l₁(V ↦ Addr a), sh₁) ⊨_b (e₂,False) √" by(simp add: bconf_def)
  then have b2: "P ⊨ ⟨e₂,(h₁, l₁(V ↦ Addr a), sh₁),False⟩ →* ⟨e₂',(h₂, l₂, sh₂),False⟩"
    using TryCatch.hyps(6) iconf by auto
  thus ?case using TryCatchRedsFinal[OF b1] TryCatch.hyps(3-5) by (meson eval_final)
next
  case TryThrow thus ?case by (meson TryRedsFail iconf.simps(18) bconf_Try)
next
  case Nil thus ?case by(auto simp: bconfs_def)
next
  case (Cons e s₀ v s₁ es es' s₂) show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s₀) e" using Cons.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e,b) √" using Cons.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨Val v,s₁,False⟩" using Cons.hyps(2) iconf by auto
    have cons: "P ⊨ ⟨e # es,s₀,b⟩ [→]* ⟨Val v # es,s₁,False⟩" by(rule ListReds1[OF b1])
    then have iconf2': "iconfs (shp s₁) es" using Reds_preserves_iconf[OF wwf cons] None Cons by auto
    have "P,shp s₁ ⊨_b (es,False) √" by(simp add: bconfs_def)
    then have b2: "P ⊨ ⟨es,s₁,False⟩ [→]* ⟨es',s₂,False⟩" using Cons.hyps(4)[OF iconf2'] by auto
    show ?thesis using ListRedsVal[OF b1 b2] by auto
  next
    case (Some a)
    then obtain b1 where b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨Val v,s₁,b1⟩"
      by (metis (no_types, lifting) Cons.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have cons: "P ⊨ ⟨e # es,s₀,b⟩ [→]* ⟨Val v # es,s₁,b1⟩" by(rule ListReds1[OF b1])
    then have iconf2': "iconfs (shp s₁) es" using Reds_preserves_iconf[OF wwf cons] Cons by auto
    have bconf2: "P,shp s₀ ⊨_b (es,b) √" using Cons.prems Some by simp
    then have "P,shp s₁ ⊨_b (es,b1) √" using Reds_preserves_bconf[OF wwf cons Cons.prems] by simp
    then have b2: "P ⊨ ⟨es,s₁,b1⟩ [→]* ⟨es',s₂,False⟩" using Cons.hyps(4)[OF iconf2'] by auto
    show ?thesis using ListRedsVal[OF b1 b2] by auto
  qed
next
  case (ConsThrow e s₀ e' s₁ es) show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s₀) e" using ConsThrow.prems(1) by simp
    have bconf: "P,shp s₀ ⊨_b (e,b) √" using ConsThrow.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s₀,b⟩ →* ⟨throw e',s₁,False⟩" using ConsThrow.hyps(2) iconf by auto
    have cons: "P ⊨ ⟨e # es,s₀,b⟩ [→]* ⟨throw e' # es,s₁,False⟩" by(rule ListReds1[OF b1])
    then show ?thesis by fast
  next
    case (Some a)
    then show ?thesis using eval_final_same[OF ConsThrow.hyps(1)] val_of_spec[OF Some] by auto
  qed
next
  case (InitFinal e s e' s' C b')
  then have "¬sub_RI e" by simp
  then show ?case using InitFinal RedInit[of e C b' s b P]
    by (meson converse_rtrancl_into_rtrancl nsub_RI_iconf red_preserves_bconf RedInit)
next
  case (InitNone sh C C' Cs e h l e' s')
  then have init: "P ⊨ ⟨INIT C' (C # Cs,False) ← e,(h, l, sh(C ↦ (sblank P C, Prepared))),b⟩ →* ⟨e',s',False⟩"
    by(simp add: bconf_def)
  show ?case by(rule InitNoneReds[OF InitNone.hyps(1) init])
next
  case (InitDone sh C sfs C' Cs e h l e' s')
  then have "iconf (shp (h, l, sh)) (INIT C' (Cs,True) ← e)" using InitDone.hyps(1)
  proof(cases Cs)
    case Nil
    then have "C = C'" "¬sub_RI e" using InitDone.prems(1) by simp+
    then show ?thesis using Nil InitDone.hyps(1) by(simp add: initPD_def)
  qed(auto)
  then have init: "P ⊨ ⟨INIT C' (Cs,True) ← e,(h, l, sh),b⟩ →* ⟨e',s',False⟩"
    using InitDone by(simp add: bconf_def)
  show ?case by(rule InitDoneReds[OF InitDone.hyps(1) init])
next
  case (InitProcessing sh C sfs C' Cs e h l e' s')
  then have "iconf (shp (h, l, sh)) (INIT C' (Cs,True) ← e)" using InitProcessing.hyps(1)
  proof(cases Cs)
    case Nil
    then have "C = C'" "¬sub_RI e" using InitProcessing.prems(1) by simp+
    then show ?thesis using Nil InitProcessing.hyps(1) by(simp add: initPD_def)
  qed(auto)
  then have init: "P ⊨ ⟨INIT C' (Cs,True) ← e,(h, l, sh),b⟩ →* ⟨e',s',False⟩"
    using InitProcessing by(simp add: bconf_def)
  show ?case by(rule InitProcessingReds[OF InitProcessing.hyps(1) init])
next
  case InitError thus ?case by(fastforce intro: InitErrorReds simp: bconf_def)
next
  case InitObject thus ?case by(fastforce intro: InitObjectReds simp: bconf_def)
next
  case InitNonObject thus ?case by(fastforce intro: InitNonObjectReds simp: bconf_def)
next
  case InitRInit thus ?case by(fastforce intro: RedsInitRInit simp: bconf_def)
next
  case (RInit e s v h' l' sh' C sfs i sh'' C' Cs e' e₁ s₁)
  then have iconf2: "iconf (shp (h', l', sh'')) (INIT C' (Cs,True) ← e')"
    by(auto simp: initPD_def fun_upd_same list_nonempty_induct)
  show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s) e" using RInit.prems(1) by simp
    have bconf: "P,shp s ⊨_b (e,b) √" using RInit.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s,b⟩ →* ⟨Val v,(h',l',sh'),False⟩" using RInit.hyps(2)[OF iconf] by auto
    have "P,shp (h', l', sh'') ⊨_b (INIT C' (Cs,True) ← e',False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨INIT C' (Cs,True) ← e',(h',l',sh''),False⟩ →* ⟨e₁,s₁,False⟩"
      using RInit.hyps(7)[OF iconf2] by auto
    then show ?thesis using RedsRInit[OF b1 RInit.hyps(3-5) b2] by fast
  next
    case (Some a')
    then obtain b1 where b1: "P ⊨ ⟨e,s,b⟩ →* ⟨Val v,(h',l',sh'),b1⟩"
      by (metis (no_types, lifting) RInit.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fin: "final e" by(simp add: val_of_spec[OF Some])
    have "¬b" using RInit.prems(2) Some by(simp add: bconf_def)
    then have nb1: "¬b1" using reds_final_same[OF b1 fin] by simp
    have "P,shp (h', l', sh'') ⊨_b (INIT C' (Cs,True) ← e',b1) √" using nb1
      by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨INIT C' (Cs,True) ← e',(h', l', sh''),b1⟩ →* ⟨e₁,s₁,False⟩"
      using RInit.hyps(7)[OF iconf2] by auto
    then show ?thesis using RedsRInit[OF b1 RInit.hyps(3-5) b2] by fast
  qed
next
  case (RInitInitFail e s a h' l' sh' C sfs i sh'' D Cs e' e₁ s₁)
  have fin: "final (throw a)" using eval_final[OF RInitInitFail.hyps(1)] by simp
  then obtain a' where a': "throw a = Throw a'" by auto
  have iconf2: "iconf (shp (h', l', sh'')) (RI (D,Throw a') ; Cs ← e')"
    using RInitInitFail.prems(1) by auto
  show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s) e" using RInitInitFail.prems(1) by simp
    have bconf: "P,shp s ⊨_b (e,b) √" using RInitInitFail.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s,b⟩ →* ⟨Throw a',(h',l',sh'),False⟩"
      using RInitInitFail.hyps(2)[OF iconf] a' by auto
    have "P,shp (h', l', sh'') ⊨_b (RI (D,Throw a') ; Cs ← e',False) √" by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨RI (D,Throw a') ; Cs ← e',(h',l',sh''),False⟩ →* ⟨e₁,s₁,False⟩"
      using RInitInitFail.hyps(6) iconf2 a' by auto
    show ?thesis using RInitInitThrowReds[OF b1 RInitInitFail.hyps(3-4) b2] by fast
  next
    case (Some a1)
    then obtain b1 where b1: "P ⊨ ⟨e,s,b⟩ →* ⟨Throw a',(h',l',sh'),b1⟩" using a'
      by (metis (no_types, lifting) RInitInitFail.hyps(1) eval_cases(3) rtrancl.rtrancl_refl val_of_spec)
    have fin: "final e" by(simp add: val_of_spec[OF Some])
    have "¬b" using RInitInitFail.prems(2) Some by(simp add: bconf_def)
    then have nb1: "¬b1" using reds_final_same[OF b1 fin] by simp
    have "P,shp (h', l', sh'') ⊨_b (RI (D,Throw a') ; Cs ← e',b1) √" using nb1
      by(simp add: bconf_def)
    then have b2: "P ⊨ ⟨RI (D,Throw a') ; Cs ← e',(h', l', sh''),b1⟩ →* ⟨e₁,s₁,False⟩"
      using RInitInitFail.hyps(6) iconf2 a' by auto
    show ?thesis using RInitInitThrowReds[OF b1 RInitInitFail.hyps(3-4) b2] by fast
  qed
next
  case (RInitFailFinal e s a h' l' sh' C sfs i sh'' e')
  have fin: "final (throw a)" using eval_final[OF RInitFailFinal.hyps(1)] by simp
  then obtain a' where a': "throw a = Throw a'" by auto
  show ?case
  proof(cases "val_of e")
    case None
    then have iconf: "iconf (shp s) e" using RInitFailFinal.prems(1) by simp
    have bconf: "P,shp s ⊨_b (e,b) √" using RInitFailFinal.prems(2) None by simp
    then have b1: "P ⊨ ⟨e,s,b⟩ →* ⟨Throw a',(h',l',sh'),False⟩"
      using RInitFailFinal.hyps(2)[OF iconf] a' by auto
    show ?thesis using RInitThrowReds[OF b1 RInitFailFinal.hyps(3-4)] a' by fast
  next
    case (Some a1)
    then show ?thesis using eval_final_same[OF RInitFailFinal.hyps(1)] val_of_spec[OF Some] by auto
  qed
qed
(*>*)


subsection‹Big steps simulates small step›

text‹ This direction was carried out by Norbert Schirmer and Daniel
  (and modified to include statics and DCI by Susannah Mansky). ›

text ‹ The big step equivalent of @{text RedWhile}: ›

lemma unfold_while: 
  "P ⊨ ⟨while(b) c,s⟩ ==> ⟨e',s'⟩ = P ⊨ ⟨if(b) (c;;while(b) c) else (unit),s⟩ ==> ⟨e',s'⟩"
(*<*)
proof
  assume "P ⊨ ⟨while (b) c,s⟩ ==> ⟨e',s'⟩"
  thus "P ⊨ ⟨if (b) (c;; while (b) c) else unit,s⟩ ==> ⟨e',s'⟩"
    by cases (fastforce intro: eval_evals.intros)+
next
  assume "P ⊨ ⟨if (b) (c;; while (b) c) else unit,s⟩ ==> ⟨e',s'⟩"
  thus "P ⊨ ⟨while (b) c,s⟩ ==> ⟨e',s'⟩"
  proof (cases)
    fix a
    assume e': "e' = throw a"
    assume "P ⊨ ⟨b,s⟩ ==> ⟨throw a,s'⟩"  
    hence "P ⊨ ⟨while(b) c,s⟩ ==> ⟨throw a,s'⟩" by (rule WhileCondThrow)
    with e' show ?thesis by simp
  next
    fix s₁
    assume eval_false: "P ⊨ ⟨b,s⟩ ==> ⟨false,s₁⟩"
    and eval_unit: "P ⊨ ⟨unit,s₁⟩ ==> ⟨e',s'⟩"
    with eval_unit have "s' = s₁" "e' = unit" by (auto elim: eval_cases)
    moreover from eval_false have "P ⊨ ⟨while (b) c,s⟩ ==> ⟨unit,s₁⟩"
      by - (rule WhileF, simp)
    ultimately show ?thesis by simp
  next
    fix s₁
    assume eval_true: "P ⊨ ⟨b,s⟩ ==> ⟨true,s₁⟩"
    and eval_rest: "P ⊨ ⟨c;; while (b) c,s₁⟩==>⟨e',s'⟩"
    from eval_rest show ?thesis
    proof (cases)
      fix s₂ v₁
      assume "P ⊨ ⟨c,s₁⟩ ==> ⟨Val v₁,s₂⟩" "P ⊨ ⟨while (b) c,s₂⟩ ==> ⟨e',s'⟩"
      with eval_true show "P ⊨ ⟨while(b) c,s⟩ ==> ⟨e',s'⟩" by (rule WhileT)
    next
      fix a
      assume "P ⊨ ⟨c,s₁⟩ ==> ⟨throw a,s'⟩" "e' = throw a"
      with eval_true show "P ⊨ ⟨while(b) c,s⟩ ==> ⟨e',s'⟩"        
        by (iprover intro: WhileBodyThrow)
    qed
  qed
qed
(*>*)


lemma blocksEval:
  "∧Ts vs l l'. [size ps = size Ts; size ps = size vs; P ⊨ ⟨blocks(ps,Ts,vs,e),(h,l,sh)⟩ ==> ⟨e',(h',l',sh')⟩ ]
    ==> ∃ l''. P ⊨ ⟨e,(h,l(ps[↦]vs),sh)⟩ ==> ⟨e',(h',l'',sh')⟩"
(*<*)
proof (induct ps)
  case Nil then show ?case by fastforce
next
  case (Cons p ps')
  have length_eqs: "length (p # ps') = length Ts" 
                   "length (p # ps') = length vs" by fact+
  then obtain T Ts' where Ts: "Ts = T#Ts'" by (cases "Ts") simp
  obtain v vs' where vs: "vs = v#vs'" using length_eqs by (cases "vs") simp
  have "P ⊨ ⟨blocks (p # ps', Ts, vs, e),(h,l,sh)⟩ ==> ⟨e',(h', l',sh')⟩" by fact
  with Ts vs 
  have "P ⊨ ⟨{p:T := Val v; blocks (ps', Ts', vs', e)},(h,l,sh)⟩ ==> ⟨e',(h', l',sh')⟩"
    by simp
  then obtain l''' where
    eval_ps': "P ⊨ ⟨blocks (ps', Ts', vs', e),(h, l(p↦v), sh)⟩ ==> ⟨e',(h', l''', sh')⟩"
    and l''': "l'=l'''(p:=l p)"
    by (auto elim!: eval_cases)
  then obtain l'' where 
    hyp: "P ⊨ ⟨e,(h, l(p↦v, ps'[↦]vs'), sh)⟩ ==> ⟨e',(h', l'', sh')⟩"
    using length_eqs Ts vs Cons.hyps [OF _ _ eval_ps'] by auto
  from hyp
  show "∃l''. P ⊨ ⟨e,(h, l(p # ps'[↦]vs), sh)⟩ ==> ⟨e',(h', l'', sh')⟩"
    using Ts vs by auto
qed
(*>*)

lemma
assumes wf: "wwf_J_prog P"
shows eval_restrict_lcl:
  "P ⊨ ⟨e,(h,l,sh)⟩ ==> ⟨e',(h',l',sh')⟩ ==> (∧W. fv e ⊆ W ==> P ⊨ ⟨e,(h,l|`W,sh)⟩ ==> ⟨e',(h',l'|`W,sh')⟩)"
and "P ⊨ ⟨es,(h,l,sh)⟩ [==>] ⟨es',(h',l',sh')⟩ ==> (∧W. fvs es ⊆ W ==> P ⊨ ⟨es,(h,l|`W,sh)⟩ [==>] ⟨es',(h',l'|`W,sh')⟩)"
(*<*)
proof(induct rule:eval_evals_inducts)
  case (Block e₀ h₀ l₀ V sh₀ e₁ h₁ l₁ sh₁ T)
  have IH: "∧W. fv e₀ ⊆ W ==> P ⊨ ⟨e₀,(h₀,l₀(V:=None)|`W,sh<sub>0</sub>)⟩ ==> ⟨e<sub>1</sub>,(h<sub>1</sub>,l<sub>1</sub>|`W,sh₁)⟩" by fact
  have "fv({V:T; e₀}) ⊆ W" by fact+
  hence "fv e₀ - {V} ⊆ W" by simp_all
  hence "fv e₀ ⊆ insert V W" by fast
  from IH[OF this]
  have "P ⊨ ⟨e₀,(h₀, (l₀|`W)(V := None), sh<sub>0</sub>)⟩ ==> ⟨e<sub>1</sub>,(h<sub>1</sub>, l<sub>1</sub>|`insert V W, sh₁)⟩"
    by fastforce
  from eval_evals.Block[OF this] show ?case by fastforce
next
  case Seq thus ?case by simp (blast intro:eval_evals.Seq)
next
  case New thus ?case by(simp add:eval_evals.intros)
next
  case NewFail thus ?case by(simp add:eval_evals.intros)
next
  case (NewInit sh C h l v' h' l' sh' a h'')
  have "fv(INIT C ([C],False) ← unit) ⊆ W" by simp
  then have "P ⊨ ⟨INIT C ([C],False) ← unit,(h, l |` W, sh)⟩ ==> ⟨Val v',(h', l' |` W, sh')⟩"
    by (simp add: NewInit.hyps(3))
  thus ?case using NewInit.hyps(1,4-6) eval_evals.NewInit by blast
next
  case (NewInitOOM sh C h l v' h' l' sh')
  have "fv(INIT C ([C],False) ← unit) ⊆ W" by simp
  then have "P ⊨ ⟨INIT C ([C],False) ← unit,(h, l |` W, sh)⟩ ==> ⟨Val v',(h', l' |` W, sh')⟩"
    by (simp add: NewInitOOM.hyps(3))
  thus ?case
    using NewInitOOM.hyps(1,4,5) eval_evals.NewInitOOM by auto
next
  case NewInitThrow thus ?case by(simp add:eval_evals.intros)
next
  case Cast thus ?case by simp (blast intro:eval_evals.Cast)
next
  case CastNull thus ?case by simp (blast intro:eval_evals.CastNull)
next
  case CastFail thus ?case by simp (blast intro:eval_evals.CastFail)
next
  case CastThrow thus ?case by(simp add:eval_evals.intros)
next
  case Val thus ?case by(simp add:eval_evals.intros)
next
  case BinOp thus ?case by simp (blast intro:eval_evals.BinOp)
next
  case BinOpThrow1 thus ?case by simp (blast intro:eval_evals.BinOpThrow1)
next
  case BinOpThrow2 thus ?case by simp (blast intro:eval_evals.BinOpThrow2)
next
  case Var thus ?case by(simp add:eval_evals.intros)
next
  case (LAss e h₀ l₀ sh₀ v h l sh l' V)
  have IH: "∧W. fv e ⊆ W ==> P ⊨ ⟨e,(h₀,l₀|`W,sh<sub>0</sub>)⟩ ==> ⟨Val v,(h,l|`W,sh)⟩"
   and [simp]: "l' = l(V ↦ v)" by fact+
  have "fv (V:=e) ⊆ W" by fact
  hence fv: "fv e ⊆ W" and VinW: "V ∈ W" by auto
  from eval_evals.LAss[OF IH[OF fv] refl, of V] VinW
  show ?case by simp
next
  case LAssThrow thus ?case by(fastforce intro: eval_evals.LAssThrow)
next
  case FAcc thus ?case by simp (blast intro: eval_evals.FAcc)
next
  case FAccNull thus ?case by(fastforce intro: eval_evals.FAccNull)
next
  case FAccThrow thus ?case by(fastforce intro: eval_evals.FAccThrow)
next
  case FAccNone thus ?case by(metis eval_evals.FAccNone fv.simps(7))
next
  case FAccStatic thus ?case by(metis eval_evals.FAccStatic fv.simps(7))
next
  case SFAcc thus ?case by simp (blast intro: eval_evals.SFAcc)
next
  case SFAccInit thus ?case by simp (blast intro: eval_evals.SFAccInit)
next
  case SFAccInitThrow thus ?case by simp (blast intro: eval_evals.SFAccInitThrow)
next
  case SFAccNone thus ?case by simp (blast intro: eval_evals.SFAccNone)
next
  case SFAccNonStatic thus ?case by simp (blast intro: eval_evals.SFAccNonStatic)
next
  case FAss thus ?case by simp (blast intro: eval_evals.FAss)
next
  case FAssNull thus ?case by simp (blast intro: eval_evals.FAssNull)
next
  case FAssThrow1 thus ?case by simp (blast intro: eval_evals.FAssThrow1)
next
  case FAssThrow2 thus ?case by simp (blast intro: eval_evals.FAssThrow2)
next
  case FAssNone thus ?case by simp (blast intro: eval_evals.FAssNone)
next
  case FAssStatic thus ?case by simp (blast intro: eval_evals.FAssStatic)
next
  case SFAss thus ?case by simp (blast intro: eval_evals.SFAss)
next
  case SFAssInit thus ?case by simp (blast intro: eval_evals.SFAssInit)
next
  case SFAssInitThrow thus ?case by simp (blast intro: eval_evals.SFAssInitThrow)
next
  case SFAssThrow thus ?case by simp (blast intro: eval_evals.SFAssThrow)
next
  case SFAssNone thus ?case by simp (blast intro: eval_evals.SFAssNone)
next
  case SFAssNonStatic thus ?case by simp (blast intro: eval_evals.SFAssNonStatic)
next
  case CallObjThrow thus ?case by simp (blast intro: eval_evals.intros)
next
  case CallNull thus ?case by simp (blast intro: eval_evals.CallNull)
next
  case (CallNone e h l sh a h' l' sh' ps vs h₂ l₂ sh₂ C fs M)
  have f1: "P ⊨ ⟨e,(h, l |` W, sh)⟩ ==> ⟨addr a,(h', l' |` W, sh')⟩"
    by (metis (no_types) fv.simps(11) le_sup_iff local.CallNone(2) local.CallNone(7))
  have "P ⊨ ⟨ps,(h', l' |` W, sh')⟩ [==>] ⟨map Val vs, (h<sub>2</sub>, l<sub>2</sub> |` W, sh₂)⟩"
    using local.CallNone(4) local.CallNone(7) by auto
  then show ?case
    using f1 eval_evals.CallNone local.CallNone(5) local.CallNone(6) by auto
next
  case CallStatic thus ?case
    by (metis (no_types, lifting) eval_evals.CallStatic fv.simps(11) le_sup_iff)
next
  case CallParamsThrow thus ?case
    by simp (blast intro: eval_evals.CallParamsThrow)
next
  case (Call e h₀ l₀ sh₀ a h₁ l₁ sh₁ ps vs h₂ l₂ sh₂ C fs M Ts T pns body
      D l₂' e' h₃ l₃ sh₃)
  have IHe: "∧W. fv e ⊆ W ==> P ⊨ ⟨e,(h₀,l₀|`W,sh<sub>0</sub>)⟩ ==> ⟨addr a,(h<sub>1</sub>,l<sub>1</sub>|`W,sh₁)⟩"
   and IHps: "∧W. fvs ps ⊆ W ==> P ⊨ ⟨ps,(h₁,l₁|`W,sh<sub>1</sub>)⟩ [==>] ⟨map Val vs,(h<sub>2</sub>,l<sub>2</sub>|`W,sh₂)⟩"
   and IHbd: "∧W. fv body ⊆ W ==> P ⊨ ⟨body,(h₂,l₂'|`W,sh<sub>2</sub>)⟩ ==> ⟨e',(h<sub>3</sub>,l<sub>3</sub>|`W,sh₃)⟩"
   and h₂a: "h₂ a = Some (C, fs)"
   and "method": "P ⊨ C sees M,NonStatic: Ts→T = (pns, body) in D"
   and same_len: "size vs = size pns"
   and l₂': "l₂' = [this ↦ Addr a, pns [↦] vs]" by fact+
  have "fv (e∙M(ps)) ⊆ W" by fact
  hence fve: "fv e ⊆ W" and fvps: "fvs(ps) ⊆ W" by auto
  have wfmethod: "size Ts = size pns ∧ this ∉ set pns" and
       fvbd: "fv body ⊆ {this} ∪ set pns"
    using "method" wf by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  show ?case
    using IHbd[OF fvbd] l₂' same_len wfmethod h₂a
      eval_evals.Call[OF IHe[OF fve] IHps[OF fvps] _ "method" same_len l₂']
    by (simp add:subset_insertI)
next
  case (SCallNone ps h l sh vs h' l' sh' C M)
  have "P ⊨ ⟨ps,(h, l |` W, sh)⟩ [==>] ⟨map Val vs,(h', l' |` W, sh')⟩"
    using SCallNone.hyps(2) SCallNone.prems by auto
  then show ?case using SCallNone.hyps(3) eval_evals.SCallNone by auto
next
  case SCallNonStatic thus ?case by (metis eval_evals.SCallNonStatic fv.simps(12))
next
  case SCallParamsThrow thus ?case
    by simp (blast intro: eval_evals.SCallParamsThrow)
next
  case SCallInitThrow thus ?case by simp (blast intro: eval_evals.SCallInitThrow)
next
  case SCallInit thus ?case by simp (blast intro: eval_evals.SCallInit)
next
  case (SCall ps h₀ l₀ sh₀ vs h₂ l₂ sh₂ C M Ts T pns body D sfs l₂' e' h₃ l₃ sh₃)
  have IHps: "∧W. fvs ps ⊆ W ==> P ⊨ ⟨ps,(h₀,l₀|`W,sh<sub>0</sub>)⟩ [==>] ⟨map Val vs,(h<sub>2</sub>,l<sub>2</sub>|`W,sh₂)⟩"
   and IHbd: "∧W. fv body ⊆ W ==> P ⊨ ⟨body,(h₂,l₂'|`W,sh<sub>2</sub>)⟩ ==> ⟨e',(h<sub>3</sub>,l<sub>3</sub>|`W,sh₃)⟩"
   and sh₂D: "sh₂ D = Some (sfs, Done) ∨ M = clinit ∧ sh₂ D = ⌊(sfs, Processing)⌋"
   and "method": "P ⊨ C sees M,Static: Ts→T = (pns, body) in D"
   and same_len: "size vs = size pns"
   and l₂': "l₂' = [pns [↦] vs]" by fact+
  have "fv (C∙_sM(ps)) ⊆ W" by fact
  hence fvps: "fvs(ps) ⊆ W" by auto
  have wfmethod: "size Ts = size pns" and fvbd: "fv body ⊆ set pns"
    using "method" wf by(fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  show ?case
    using IHbd[OF fvbd] l₂' same_len wfmethod sh₂D
      eval_evals.SCall[OF IHps[OF fvps] "method" _ same_len l₂']
    by (simp add:subset_insertI)
next
  case SeqThrow thus ?case by simp (blast intro: eval_evals.SeqThrow)
next
  case CondT thus ?case by simp (blast intro: eval_evals.CondT)
next
  case CondF thus ?case by simp (blast intro: eval_evals.CondF)
next
  case CondThrow thus ?case by simp (blast intro: eval_evals.CondThrow)
next
  case WhileF thus ?case by simp (blast intro: eval_evals.WhileF)
next
  case WhileT thus ?case by simp (blast intro: eval_evals.WhileT)
next
  case WhileCondThrow thus ?case by simp (blast intro: eval_evals.WhileCondThrow)
next
  case WhileBodyThrow thus ?case by simp (blast intro: eval_evals.WhileBodyThrow)
next
  case Throw thus ?case by simp (blast intro: eval_evals.Throw)
next
  case ThrowNull thus ?case by simp (blast intro: eval_evals.ThrowNull)
next
  case ThrowThrow thus ?case by simp (blast intro: eval_evals.ThrowThrow)
next
  case Try thus ?case by simp (blast intro: eval_evals.Try)
next
  case (TryCatch e₁ h₀ l₀ sh₀ a h₁ l₁ sh₁ D fs C e₂ V e₂' h₂ l₂ sh₂)
  have IH₁: "∧W. fv e₁ ⊆ W ==> P ⊨ ⟨e₁,(h₀,l₀|`W,sh<sub>0</sub>)⟩ ==> ⟨Throw a,(h<sub>1</sub>,l<sub>1</sub>|`W,sh₁)⟩"
   and IH₂: "∧W. fv e₂ ⊆ W ==> P ⊨ ⟨e₂,(h₁,l₁(V↦Addr a)|`W,sh<sub>1</sub>)⟩ ==> ⟨e<sub>2</sub>',(h<sub>2</sub>,l<sub>2</sub>|`W,sh₂)⟩"
   and lookup: "h₁ a = Some(D, fs)" and subtype: "P ⊨ D ⪯^* C" by fact+
  have "fv (try e₁ catch(C V) e₂) ⊆ W" by fact
  hence fv₁: "fv e₁ ⊆ W" and fv₂: "fv e₂ ⊆ insert V W" by auto
  have IH₂': "P ⊨ ⟨e₂,(h₁,(l₁|`W)(V ↦ Addr a),sh<sub>1</sub>)⟩ ==> ⟨e<sub>2</sub>',(h<sub>2</sub>,l<sub>2</sub>|`insert V W,sh₂)⟩"
    using IH₂[OF fv₂] fun_upd_restrict[of l₁ W] (*FIXME just l|W instead of l|(W-V) in simp rule??*) by simp
  with eval_evals.TryCatch[OF IH₁[OF fv₁] _ subtype IH₂'] lookup
  show ?case by fastforce
next
  case TryThrow thus ?case by simp (blast intro: eval_evals.TryThrow)
next
  case Nil thus ?case by (simp add: eval_evals.Nil)
next
  case Cons thus ?case by simp (blast intro: eval_evals.Cons)
next
  case ConsThrow thus ?case by simp (blast intro: eval_evals.ConsThrow)
next
  case InitFinal thus ?case by (simp add: eval_evals.InitFinal)
next
  case InitNone thus ?case by(blast intro: eval_evals.InitNone)
next
  case InitDone thus ?case
    by (simp add: InitDone.hyps(2) InitDone.prems eval_evals.InitDone)
next
  case InitProcessing thus ?case by (simp add: eval_evals.InitProcessing)
next
  case InitError thus ?case using eval_evals.InitError by auto
next
  case InitObject thus ?case by(simp add: eval_evals.InitObject)
next
  case InitNonObject thus ?case by(simp add: eval_evals.InitNonObject)
next
  case InitRInit thus ?case by(simp add: eval_evals.InitRInit)
next
  case (RInit e h l sh v h' l' sh' C sfs i sh'' C' Cs e' e₁ h₁ l₁ sh₁)
  have f1: "fv e ⊆ W ∧ fv (INIT C' (Cs,True) ← e') ⊆ W"
    using RInit.prems by auto
  then have f2: "P ⊨ ⟨e,(h, l |` W, sh)⟩ ==> ⟨Val v,(h', l' |` W, sh')⟩"
    using RInit.hyps(2) by blast
  have "P ⊨ ⟨INIT C' (Cs,True) ← e', (h', l' |` W, sh'')⟩ ==> ⟨e<sub>1</sub>,(h<sub>1</sub>, l<sub>1</sub> |` W, sh₁)⟩"
    using f1 by (meson RInit.hyps(7))
  then show ?case
    using f2 RInit.hyps(3) RInit.hyps(4) RInit.hyps(5) eval_evals.RInit by blast
next
  case (RInitInitFail e h l sh a h' l' sh' C sfs i sh'' D Cs e' e₁ h₁ l₁ sh₁)
  have f1: "fv e ⊆ W" "fv e' ⊆ W"
    using RInitInitFail.prems by auto
  then have f2: "P ⊨ ⟨e,(h, l |` W, sh)⟩ ==> ⟨throw a,(h', l' |` W, sh')⟩"
    using RInitInitFail.hyps(2) by blast
  then have f2': "fv (throw a) ⊆ W"
    using eval_final[OF f2] by auto
  then have f1': "fv (RI (D,throw a);Cs ← e') ⊆ W"
    using f1 by auto
  have "P ⊨ ⟨RI (D,throw a);Cs ← e', (h', l' |` W, sh'')⟩ ==> ⟨e<sub>1</sub>,(h<sub>1</sub>, l<sub>1</sub> |` W, sh₁)⟩"
    using f1' by (meson RInitInitFail.hyps(6))
  then show ?case
    using f2 by (simp add: RInitInitFail.hyps(3,4) eval_evals.RInitInitFail)
next
  case (RInitFailFinal e h l sh a h' l' sh' sh'' C)
  have f1: "fv e ⊆ W"
    using RInitFailFinal.prems by auto
  then have f2: "P ⊨ ⟨e,(h, l |` W, sh)⟩ ==> ⟨throw a,(h', l' |` W, sh')⟩"
    using RInitFailFinal.hyps(2) by blast
  then have f2': "fv (throw a) ⊆ W"
    using eval_final[OF f2] by auto
  then show ?case using f2 RInitFailFinal.hyps(3,4) eval_evals.RInitFailFinal by blast
qed
(*>*)


lemma eval_notfree_unchanged:
  "P ⊨ ⟨e,(h,l,sh)⟩ ==> ⟨e',(h',l',sh')⟩ ==> (∧V. V ∉ fv e ==> l' V = l V)"
and "P ⊨ ⟨es,(h,l,sh)⟩ [==>] ⟨es',(h',l',sh')⟩ ==> (∧V. V ∉ fvs es ==> l' V = l V)"
(*<*)
proof(induct rule:eval_evals_inducts)
  case LAss thus ?case by(simp add:fun_upd_apply)
next
  case Block thus ?case
    by (simp only:fun_upd_apply split:if_splits) fastforce
next
  case TryCatch thus ?case
    by (simp only:fun_upd_apply split:if_splits) fastforce
next
  case (RInitInitFail e h l sh a h' l' sh' C sfs i sh'' D Cs e₁ h₁ l₁ sh₁)
  have "fv (throw a) = {}"
    using RInitInitFail.hyps(1) eval_final final_fv by blast 
  then have "fv e ∪ fv (RI (D,throw a) ; Cs ← unit) ⊆ fv (RI (C,e) ; D#Cs ← unit)" 
    by auto
  then show ?case using RInitInitFail.hyps(2,6) RInitInitFail.prems by fastforce
qed simp_all
(*>*)


lemma eval_closed_lcl_unchanged:
  "[ P ⊨ ⟨e,(h,l,sh)⟩ ==> ⟨e',(h',l',sh')⟩; fv e = {} ] ==> l' = l"
(*<*)by(fastforce dest:eval_notfree_unchanged simp add:fun_eq_iff [where 'b="val option"])(*>*)


lemma list_eval_Throw: 
assumes eval_e: "P ⊨ ⟨throw x,s⟩ ==> ⟨e',s'⟩"
shows "P ⊨ ⟨map Val vs @ throw x # es',s⟩ [==>] ⟨map Val vs @ e' # es',s'⟩"
(*<*)
proof -
  from eval_e 
  obtain a where e': "e' = Throw a"
    by (cases) (auto dest!: eval_final)
  {
    fix es
    have "∧vs. es = map Val vs @ throw x # es'
           ==> P ⊨ ⟨es,s⟩[==>]⟨map Val vs @ e' # es',s'⟩"
    proof (induct es type: list)
      case Nil thus ?case by simp
    next
      case (Cons e es vs)
      have e_es: "e # es = map Val vs @ throw x # es'" by fact
      show "P ⊨ ⟨e # es,s⟩ [==>] ⟨map Val vs @ e' # es',s'⟩"
      proof (cases vs)
        case Nil
        with e_es obtain "e=throw x" "es=es'" by simp
        moreover from eval_e e'
        have "P ⊨ ⟨throw x # es,s⟩ [==>] ⟨Throw a # es,s'⟩"
          by (iprover intro: ConsThrow)
        ultimately show ?thesis using Nil e' by simp
      next
        case (Cons v vs')
        have vs: "vs = v # vs'" by fact
        with e_es obtain 
          e: "e=Val v" and es:"es= map Val vs' @ throw x # es'"
          by simp
        from e 
        have "P ⊨ ⟨e,s⟩ ==> ⟨Val v,s⟩"
          by (iprover intro: eval_evals.Val)
        moreover from es 
        have "P ⊨ ⟨es,s⟩ [==>] ⟨map Val vs' @ e' # es',s'⟩"
          by (rule Cons.hyps)
        ultimately show 
          "P ⊨ ⟨e#es,s⟩ [==>] ⟨map Val vs @ e' # es',s'⟩"
          using vs by (auto intro: eval_evals.Cons)
      qed
    qed
  }
  thus ?thesis
    by simp
qed
(*>*)

― ‹ separate evaluation of first subexp of a sequence ›
lemma seq_ext:
assumes IH: "∧e' s'. P ⊨ ⟨e'',s''⟩ ==> ⟨e',s'⟩ ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩"
 and seq: "P ⊨ ⟨e'' ;; e₀,s''⟩ ==> ⟨e',s'⟩"
shows "P ⊨ ⟨e ;; e₀,s⟩ ==> ⟨e',s'⟩"
proof(rule eval_cases(14)[OF seq]) ― ‹ Seq ›
  fix v' s₁ assume e'': "P ⊨ ⟨e'',s''⟩ ==> ⟨Val v',s₁⟩" and estep: "P ⊨ ⟨e₀,s₁⟩ ==> ⟨e',s'⟩"
  have "P ⊨ ⟨e,s⟩ ==> ⟨Val v',s₁⟩" using e'' IH by simp
  then show ?thesis using estep Seq by simp
next
  fix e_t assume e'': "P ⊨ ⟨e'',s''⟩ ==> ⟨throw e_t,s'⟩" and e': "e' = throw e_t"
  have "P ⊨ ⟨e,s⟩ ==> ⟨throw e_t,s'⟩" using e'' IH by simp
  then show ?thesis using eval_evals.SeqThrow e' by simp
qed

― ‹ separate evaluation of @{text RI} subexp, val case ›
lemma rinit_Val_ext:
assumes ri: "P ⊨ ⟨RI (C,e'') ; Cs ← e₀,s''⟩ ==> ⟨Val v',s₁⟩"
 and IH: "∧e' s'. P ⊨ ⟨e'',s''⟩ ==> ⟨e',s'⟩ ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩"
shows "P ⊨ ⟨RI (C,e) ; Cs ← e₀,s⟩ ==> ⟨Val v',s₁⟩"
proof(rule eval_cases(20)[OF ri]) ― ‹ RI ›
  fix v'' h' l' sh' sfs i
  assume e''step: "P ⊨ ⟨e'',s''⟩ ==> ⟨Val v'',(h', l', sh')⟩"
     and shC: "sh' C = ⌊(sfs, i)⌋"
     and init: "P ⊨ ⟨INIT (if Cs = [] then C else last Cs) (Cs,True) ← e₀,(h', l', sh'(C ↦ (sfs, Done)))⟩ ==>
        ⟨Val v',s₁⟩"
  have "P ⊨ ⟨e,s⟩ ==> ⟨Val v'',(h', l', sh')⟩" using IH[OF e''step] by simp
  then show ?thesis using RInit init shC by auto
next
  fix a h' l' sh' sfs i D Cs'
  assume e''step: "P ⊨ ⟨e'',s''⟩ ==> ⟨throw a,(h', l', sh')⟩"
     and riD: "P ⊨ ⟨RI (D,throw a) ; Cs' ← e₀,(h', l', sh'(C ↦ (sfs, Error)))⟩ ==> ⟨Val v',s₁⟩"
  have "P ⊨ ⟨e,s⟩ ==> ⟨throw a,(h', l', sh')⟩" using IH[OF e''step] by simp
  then show ?thesis using riD rinit_throwE by blast
qed(simp)

― ‹ separate evaluation of @{text RI} subexp, throw case ›
lemma rinit_throw_ext:
assumes ri: "P ⊨ ⟨RI (C,e'') ; Cs ← e₀,s''⟩ ==> ⟨throw e_t,s'⟩"
 and IH: "∧e' s'. P ⊨ ⟨e'',s''⟩ ==> ⟨e',s'⟩ ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩"
shows "P ⊨ ⟨RI (C,e) ; Cs ← e₀,s⟩ ==> ⟨throw e_t,s'⟩"
proof(rule eval_cases(20)[OF ri]) ― ‹ RI ›
  fix v h' l' sh' sfs i
  assume e''step: "P ⊨ ⟨e'',s''⟩ ==> ⟨Val v,(h', l', sh')⟩"
     and shC: "sh' C = ⌊(sfs, i)⌋"
     and init: "P ⊨ ⟨INIT (if Cs = [] then C else last Cs) (Cs,True) ← e₀,(h', l', sh'(C ↦ (sfs, Done)))⟩ ==>
        ⟨throw e_t,s'⟩"
  have "P ⊨ ⟨e,s⟩ ==> ⟨Val v,(h', l', sh')⟩" using IH[OF e''step] by simp
  then show ?thesis using RInit init shC by auto
next
  fix a h' l' sh' sfs i D Cs'
  assume e''step: "P ⊨ ⟨e'',s''⟩ ==> ⟨throw a,(h', l', sh')⟩"
     and shC: "sh' C = ⌊(sfs, i)⌋"
     and riD: "P ⊨ ⟨RI (D,throw a) ; Cs' ← e₀,(h', l', sh'(C ↦ (sfs, Error)))⟩ ==> ⟨throw e_t,s'⟩"
     and cons: "Cs = D # Cs'"
  have estep': "P ⊨ ⟨e,s⟩ ==> ⟨throw a,(h', l', sh')⟩" using IH[OF e''step] by simp
  then show ?thesis using RInitInitFail cons riD shC by simp
next
  fix a h' l' sh' sfs i
  assume "throw e_t = throw a"
     and "s' = (h', l', sh'(C ↦ (sfs, Error)))"
     and "P ⊨ ⟨e'',s''⟩ ==> ⟨throw a,(h', l', sh')⟩"
     and "sh' C = ⌊(sfs, i)⌋"
     and "Cs = []"
  then show ?thesis using RInitFailFinal IH by auto
qed

― ‹ separate evaluation of @{text RI} subexp ›
lemma rinit_ext:
assumes IH: "∧e' s'. P ⊨ ⟨e'',s''⟩ ==> ⟨e',s'⟩ ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩"
shows "∧e' s'. P ⊨ ⟨RI (C,e'') ; Cs ← e₀,s''⟩ ==> ⟨e',s'⟩
 ==> P ⊨ ⟨RI (C,e) ; Cs ← e₀,s⟩ ==> ⟨e',s'⟩"
proof -
  fix e' s' assume ri'': "P ⊨ ⟨RI (C,e'') ; Cs ← e₀,s''⟩ ==> ⟨e',s'⟩"
  then have "final e'" using eval_final by simp
  then show "P ⊨ ⟨RI (C,e) ; Cs ← e₀,s⟩ ==> ⟨e',s'⟩"
  proof(rule finalE)
    fix v assume "e' = Val v" then show ?thesis using rinit_Val_ext[OF _ IH] ri'' by simp
  next
    fix a assume "e' = throw a" then show ?thesis using rinit_throw_ext[OF _ IH] ri'' by simp
  qed
qed

― ‹ @{text INIT} and @{text RI} return either @{text Val} with @{text Done} or
 @{text Processing} flag or @{text Throw} with @{text Error} flag ›
lemma
shows eval_init_return: "P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩
  ==> iconf (shp s) e
  ==> (∃Cs b. e = INIT C' (Cs,b) ← unit) ∨ (∃C e₀ Cs e_i. e = RI(C,e₀);Cs@[C'] ← unit)
     ∨ (∃e₀. e = RI(C',e₀);Nil ← unit)
  ==> (val_of e' = Some v ⟶ (∃sfs i. shp s' C' = ⌊(sfs,i)⌋ ∧ (i = Done ∨ i = Processing)))
   ∧ (throw_of e' = Some a ⟶ (∃sfs i. shp s' C' = ⌊(sfs,Error)⌋))"
and "P ⊨ ⟨es,s⟩ [==>] ⟨es',s'⟩ ==> True"
proof(induct rule: eval_evals.inducts)
  case (InitFinal e s e' s' C b) then show ?case
    by(fastforce simp: initPD_def dest: eval_final_same)
next
  case (InitDone sh C sfs C' Cs e h l e' s')
  then have "final e'" using eval_final by simp
  then show ?case
  proof(rule finalE)
    fix v assume e': "e' = Val v" then show ?thesis using InitDone initPD_def
    proof(cases Cs) qed(auto)
  next
    fix a assume e': "e' = throw a" then show ?thesis using InitDone initPD_def
    proof(cases Cs) qed(auto)
  qed
next
  case (InitProcessing sh C sfs C' Cs e h l e' s')
  then have "final e'" using eval_final by simp
  then show ?case
  proof(rule finalE)
    fix v assume e': "e' = Val v" then show ?thesis using InitProcessing initPD_def
    proof(cases Cs) qed(auto)
  next
    fix a assume e': "e' = throw a" then show ?thesis using InitProcessing initPD_def
    proof(cases Cs) qed(auto)
  qed
next
  case (InitError sh C sfs Cs e h l e' s' C') show ?case
  proof(cases Cs)
    case Nil then show ?thesis using InitError by simp
  next
    case (Cons C2 list)
    then have "final e'" using InitError eval_final by simp
    then show ?thesis
    proof(rule finalE)
      fix v assume e': "e' = Val v" then show ?thesis
      using InitError
      proof -
        obtain ccss :: "char list list" and bb :: bool where
          "INIT C' (C # Cs,False) ← e = INIT C' (ccss,bb) ← unit"
          using InitError.prems(2) by blast
        then show ?thesis using InitError.hyps(2) e' by(auto dest!: rinit_throwE)
      qed
    next
      fix a assume e': "e' = throw a"
      then show ?thesis using Cons InitError cons_to_append[of list] by clarsimp
    qed
  qed
next
  case (InitRInit C Cs h l sh e' s' C') show ?case
  proof(cases Cs)
    case Nil then show ?thesis using InitRInit by simp
  next
    case (Cons C' list) then show ?thesis
      using InitRInit Cons cons_to_append[of list] by clarsimp
  qed
next
  case (RInit e s v h' l' sh' C sfs i sh'' C' Cs e' e₁ s₁)
  then have final: "final e₁" using eval_final by simp
  then show ?case
  proof(cases Cs)
    case Nil show ?thesis using final
    proof(rule finalE)
      fix v assume e': "e₁ = Val v" show ?thesis
      using RInit Nil by(auto simp: fun_upd_same initPD_def)
    next
      fix a assume e': "e₁ = throw a" show ?thesis
      using RInit Nil by(auto simp: fun_upd_same initPD_def)
    qed
  next
    case (Cons a list) show ?thesis
    proof(rule finalE[OF final])
      fix v assume e': "e₁ = Val v" then show ?thesis
      using RInit Cons by clarsimp (metis last.simps last_appendR list.distinct(1))
    next
      fix a assume e': "e₁ = throw a" then show ?thesis
      using RInit Cons by clarsimp (metis last.simps last_appendR list.distinct(1))
    qed
  qed
next
  case (RInitInitFail e s a h' l' sh' C sfs i sh'' D Cs e' e₁ s₁)
  then have final: "final e₁" using eval_final by simp
  then show ?case
  proof(rule finalE)
    fix v assume e': "e₁ = Val v" then show ?thesis
    using RInitInitFail by clarsimp (meson exp.distinct(101) rinit_throwE)
  next
    fix a' assume e': "e₁ = Throw a'"
    then have "iconf (sh'(C ↦ (sfs, Error))) a"
      using RInitInitFail.hyps(1) eval_final by fastforce
    then show ?thesis using RInitInitFail e'
      by clarsimp (meson Cons_eq_append_conv list.inject)
  qed
qed(auto simp: fun_upd_same)

lemma init_Val_PD: "P ⊨ ⟨INIT C' (Cs,b) ← unit,s⟩ ==> ⟨Val v,s'⟩
  ==> iconf (shp s) (INIT C' (Cs,b) ← unit)
  ==> ∃sfs i. shp s' C' = ⌊(sfs,i)⌋ ∧ (i = Done ∨ i = Processing)"
 by(drule_tac v = v in eval_init_return, simp+)

lemma init_throw_PD: "P ⊨ ⟨INIT C' (Cs,b) ← unit,s⟩ ==> ⟨throw a,s'⟩
  ==> iconf (shp s) (INIT C' (Cs,b) ← unit)
  ==> ∃sfs i. shp s' C' = ⌊(sfs,Error)⌋"
 by(drule_tac a = a in eval_init_return, simp+)

lemma rinit_Val_PD: "P ⊨ ⟨RI(C,e₀);Cs ← unit,s⟩ ==> ⟨Val v,s'⟩
  ==> iconf (shp s) (RI(C,e₀);Cs ← unit) ==> last(C#Cs) = C'
  ==> ∃sfs i. shp s' C' = ⌊(sfs,i)⌋ ∧ (i = Done ∨ i = Processing)"
by(auto dest!: eval_init_return [where C'=C']
               append_butlast_last_id[THEN sym])

lemma rinit_throw_PD: "P ⊨ ⟨RI(C,e₀);Cs ← unit,s⟩ ==> ⟨throw a,s'⟩
  ==> iconf (shp s) (RI(C,e₀);Cs ← unit) ==> last(C#Cs) = C'
  ==> ∃sfs i. shp s' C' = ⌊(sfs,Error)⌋"
by(auto dest!: eval_init_return [where C'=C']
               append_butlast_last_id[THEN sym])

― ‹ combining the above to get evaluation of @{text INIT} in a sequence ›

(* Hiermit kann man die ganze pair-Splitterei in den automatischen Taktiken
abschalten. Wieder anschalten siehe nach dem Beweis. *)
(*<*)
declare split_paired_All [simp del] split_paired_Ex [simp del]
(*>*)

lemma eval_init_seq': "P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩
  ==> (∃C Cs b e_i. e = INIT C (Cs,b) ← e_i) ∨ (∃C e₀ Cs e_i. e = RI(C,e₀);Cs ← e_i)
  ==> (∃C Cs b e_i. e = INIT C (Cs,b) ← e_i ∧ P ⊨ ⟨(INIT C (Cs,b) ← unit);; e_i,s⟩ ==> ⟨e',s'⟩)
     ∨ (∃C e₀ Cs e_i. e = RI(C,e₀);Cs ← e_i ∧ P ⊨ ⟨(RI(C,e₀);Cs ← unit);; e_i,s⟩ ==> ⟨e',s'⟩)"
and "P ⊨ ⟨es,s⟩ [==>] ⟨es',s'⟩ ==> True"
proof(induct rule: eval_evals.inducts)
  case InitFinal then show ?case by(auto simp: Seq[OF eval_evals.InitFinal[OF Val[where v=Unit]]])
next
  case (InitNone sh) then show ?case
   using seq_ext[OF eval_evals.InitNone[where sh=sh and e=unit, OF InitNone.hyps(1)]] by fastforce
next
  case (InitDone sh) then show ?case
   using seq_ext[OF eval_evals.InitDone[where sh=sh and e=unit, OF InitDone.hyps(1)]] by fastforce
next
  case (InitProcessing sh) then show ?case
   using seq_ext[OF eval_evals.InitProcessing[where sh=sh and e=unit, OF InitProcessing.hyps(1)]]
     by fastforce
next
  case (InitError sh) then show ?case
   using seq_ext[OF eval_evals.InitError[where sh=sh and e=unit, OF InitError.hyps(1)]] by fastforce
next
  case (InitObject sh) then show ?case
   using seq_ext[OF eval_evals.InitObject[where sh=sh and e=unit, OF InitObject.hyps(1)]]
     by fastforce
next
  case (InitNonObject sh) then show ?case
   using seq_ext[OF eval_evals.InitNonObject[where sh=sh and e=unit, OF InitNonObject.hyps(1)]]
     by fastforce
next
  case (InitRInit C Cs e h l sh e' s' C') then show ?case
   using seq_ext[OF eval_evals.InitRInit[where e=unit]] by fastforce
next
  case RInit then show ?case
   using seq_ext[OF eval_evals.RInit[where e=unit, OF RInit.hyps(1)]] by fastforce
next
  case RInitInitFail then show ?case
   using seq_ext[OF eval_evals.RInitInitFail[where e=unit, OF RInitInitFail.hyps(1)]] by fastforce
next
  case RInitFailFinal
  then show ?case using eval_evals.RInitFailFinal eval_evals.SeqThrow by auto
qed(auto)

lemma eval_init_seq: "P ⊨ ⟨INIT C (Cs,b) ← e,(h, l, sh)⟩ ==> ⟨e',s'⟩
 ==> P ⊨ ⟨(INIT C (Cs,b) ← unit);; e,(h, l, sh)⟩ ==> ⟨e',s'⟩"
 by(auto dest: eval_init_seq')


text ‹ The key lemma: ›
lemma
assumes wf: "wwf_J_prog P"
shows extend_1_eval: "P ⊨ ⟨e,s,b⟩ → ⟨e'',s'',b''⟩ ==> P,shp s ⊨_b (e,b) √
   ==> (∧s' e'. P ⊨ ⟨e'',s''⟩ ==> ⟨e',s'⟩ ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩)"
and extend_1_evals: "P ⊨ ⟨es,s,b⟩ [→] ⟨es'',s'',b''⟩ ==> P,shp s ⊨_b (es,b) √
   ==> (∧s' es'. P ⊨ ⟨es'',s''⟩ [==>] ⟨es',s'⟩ ==> P ⊨ ⟨es,s⟩ [==>] ⟨es',s'⟩)"
proof (induct rule: red_reds.inducts)
  case (RedNew h a C FDTs h' l sh)
  then have e':"e' = addr a" and s':"s' = (h(a ↦ blank P C), l, sh)"
    using eval_cases(3) by fastforce+
  obtain sfs i where shC: "sh C = ⌊(sfs, i)⌋" and "i = Done ∨ i = Processing"
   using RedNew by (clarsimp simp: bconf_def initPD_def)
  then show ?case
  proof(cases i)
    case Done then show ?thesis using RedNew shC e' s' New by simp
  next
    case Processing
    then have shC': "∄sfs. sh C = Some(sfs,Done)" and shP: "sh C = Some(sfs,Processing)"
      using shC by simp+
    then have init: "P ⊨ ⟨INIT C ([C],False) ← unit,(h,l,sh)⟩ ==> ⟨unit,(h,l,sh)⟩"
      by(simp add: InitFinal InitProcessing Val)
    have "P ⊨ ⟨new C,(h, l, sh)⟩ ==> ⟨addr a,(h(a ↦ blank P C),l,sh)⟩"
      using RedNew shC' by(auto intro: NewInit[OF _ init])
    then show ?thesis using e' s' by simp
  qed(auto)
next
  case (RedNewFail h C l sh)
  then have e':"e' = THROW OutOfMemory" and s':"s' = (h, l, sh)"
    using eval_final_same final_def by fastforce+
  obtain sfs i where shC: "sh C = ⌊(sfs, i)⌋" and "i = Done ∨ i = Processing"
   using RedNewFail by (clarsimp simp: bconf_def initPD_def)
  then show ?case
  proof(cases i)
    case Done then show ?thesis using RedNewFail shC e' s' NewFail by simp
  next
    case Processing
    then have shC': "∄sfs. sh C = Some(sfs,Done)" and shP: "sh C = Some(sfs,Processing)"
      using shC by simp+
    then have init: "P ⊨ ⟨INIT C ([C],False) ← unit,(h,l,sh)⟩ ==> ⟨unit,(h,l,sh)⟩"
      by(simp add: InitFinal InitProcessing Val)
    have "P ⊨ ⟨new C,(h, l, sh)⟩ ==> ⟨THROW OutOfMemory,(h,l,sh)⟩"
      using RedNewFail shC' by(auto intro: NewInitOOM[OF _ init])
    then show ?thesis using e' s' by simp
  qed(auto)
next
  case (NewInitRed sh C h l)
  then have seq: "P ⊨ ⟨(INIT C ([C],False) ← unit);; new C,(h, l, sh)⟩ ==> ⟨e',s'⟩"
    using eval_init_seq by simp
  then show ?case
  proof(rule eval_cases(14)) ― ‹ Seq ›
    fix v s₁ assume init: "P ⊨ ⟨INIT C ([C],False) ← unit,(h, l, sh)⟩ ==> ⟨Val v,s₁⟩"
      and new: "P ⊨ ⟨new C,s₁⟩ ==> ⟨e',s'⟩"
    obtain h₁ l₁ sh₁ where s₁: "s₁ = (h₁,l₁,sh₁)" by(cases s₁)
    then obtain sfs i where shC: "sh₁ C = ⌊(sfs, i)⌋" and iDP: "i = Done ∨ i = Processing"
      using init_Val_PD[OF init] by auto
    show ?thesis
    proof(rule eval_cases(1)[OF new]) ― ‹ New ›
      fix sha ha a FDTs la
      assume s₁a: "s₁ = (ha, la, sha)" and e': "e' = addr a"
         and s': "s' = (ha(a ↦ blank P C), la, sha)"
         and addr: "new_Addr ha = ⌊a⌋" and fields: "P ⊨ C has_fields FDTs"
      then show ?thesis using NewInit[OF _ _ addr fields] NewInitRed.hyps init by simp
    next
      fix sha ha la
      assume "s₁ = (ha, la, sha)" and "e' = THROW OutOfMemory"
         and "s' = (ha, la, sha)" and "new_Addr ha = None"
      then show ?thesis using NewInitOOM NewInitRed.hyps init by simp
    next
      fix sha ha la v' h' l' sh' a FDTs
      assume s₁a: "s₁ = (ha, la, sha)" and e': "e' = addr a"
         and s': "s' = (h'(a ↦ blank P C), l', sh')"
         and shaC: "∀sfs. sha C ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT C ([C],False) ← unit,(ha, la, sha)⟩ ==> ⟨Val v',(h', l', sh')⟩"
         and addr: "new_Addr h' = ⌊a⌋" and fields: "P ⊨ C has_fields FDTs"
      then have i: "i = Processing" using iDP shC s₁ by simp
      then have "(h', l', sh') = (ha, la, sha)" using init' init_ProcessingE s₁ s₁a shC by blast
      then show ?thesis using NewInit NewInitRed.hyps s₁a addr fields init shaC e' s' by auto
    next
      fix sha ha la v' h' l' sh'
      assume s₁a: "s₁ = (ha, la, sha)" and e': "e' = THROW OutOfMemory"
         and s': "s' = (h', l', sh')" and "∀sfs. sha C ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT C ([C],False) ← unit,(ha, la, sha)⟩ ==> ⟨Val v',(h', l', sh')⟩"
         and addr: "new_Addr h' = None"
      then have i: "i = Processing" using iDP shC s₁ by simp
      then have "(h', l', sh') = (ha, la, sha)" using init' init_ProcessingE s₁ s₁a shC by blast
      then show ?thesis
        using NewInitOOM NewInitRed.hyps e' addr s' s₁a init by auto
    next
      fix sha ha la a
      assume s₁a: "s₁ = (ha, la, sha)"
         and "∀sfs. sha C ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT C ([C],False) ← unit,(ha, la, sha)⟩ ==> ⟨throw a,s'⟩"
      then have i: "i = Processing" using iDP shC s₁ by simp
      then show ?thesis using init' init_ProcessingE s₁ s₁a shC by blast
    qed
  next
    fix e assume e': "e' = throw e"
      and init: "P ⊨ ⟨INIT C ([C],False) ← unit,(h, l, sh)⟩ ==> ⟨throw e,s'⟩"
    obtain h' l' sh' where s': "s' = (h',l',sh')" by(cases s')
    then obtain sfs i where shC: "sh' C = ⌊(sfs, i)⌋" and iDP: "i = Error"
      using init_throw_PD[OF init] by auto
    then show ?thesis by (simp add: NewInitRed.hyps NewInitThrow e' init)
  qed
next
  case CastRed then show ?case
    by(fastforce elim!: eval_cases intro: eval_evals.intros intro!: CastFail)
next
  case RedCastNull
  then show ?case
    by simp (iprover elim: eval_cases intro: eval_evals.intros)
next
  case RedCast
  then show ?case
    by (auto elim: eval_cases intro: eval_evals.intros)
next
  case RedCastFail
  then show ?case
    by (auto elim!: eval_cases intro: eval_evals.intros)
next
  case BinOpRed1 then show ?case
    by(fastforce elim!: eval_cases intro: eval_evals.intros simp: val_no_step)
next
  case BinOpRed2
  thus ?case
    by (fastforce elim!: eval_cases intro: eval_evals.intros eval_finalId)
next
  case RedBinOp
  thus ?case
    by simp (iprover elim: eval_cases intro: eval_evals.intros)
next
  case RedVar
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case LAssRed thus ?case
    by(fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedLAss
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case FAccRed thus ?case
    by(fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedFAcc then show ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedFAccNull then show ?case
    by (fastforce elim!: eval_cases intro: eval_evals.intros)
next
  case RedFAccNone thus ?case
    by(fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedFAccStatic thus ?case
    by(fastforce elim: eval_cases intro: eval_evals.intros)
next
  case (RedSFAcc C F t D sh sfs i v h l)
  then have e':"e' = Val v" and s':"s' = (h, l, sh)"
    using eval_cases(3) by fastforce+
  have "i = Done ∨ i = Processing" using RedSFAcc by (clarsimp simp: bconf_def initPD_def)
  then show ?case
  proof(cases i)
    case Done then show ?thesis using RedSFAcc e' s' SFAcc by simp
  next
    case Processing
    then have shC': "∄sfs. sh D = Some(sfs,Done)" and shP: "sh D = Some(sfs,Processing)"
      using RedSFAcc by simp+
    then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h,l,sh)⟩ ==> ⟨unit,(h,l,sh)⟩"
      by(simp add: InitFinal InitProcessing Val)
    have "P ⊨ ⟨C∙_sF{D},(h, l, sh)⟩ ==> ⟨Val v,(h,l,sh)⟩"
      by(rule SFAccInit[OF RedSFAcc.hyps(1) shC' init shP RedSFAcc.hyps(3)])
    then show ?thesis using e' s' by simp
  qed(auto)
next
  case (SFAccInitRed C F t D sh h l)
  then have seq: "P ⊨ ⟨(INIT D ([D],False) ← unit);; C∙_sF{D},(h, l, sh)⟩ ==> ⟨e',s'⟩"
    using eval_init_seq by simp
  then show ?case
  proof(rule eval_cases(14)) ― ‹ Seq ›
    fix v s₁ assume init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh)⟩ ==> ⟨Val v,s₁⟩"
      and acc: "P ⊨ ⟨C∙_sF{D},s₁⟩ ==> ⟨e',s'⟩"
    obtain h₁ l₁ sh₁ where s₁: "s₁ = (h₁,l₁,sh₁)" by(cases s₁)
    then obtain sfs i where shD: "sh₁ D = ⌊(sfs, i)⌋" and iDP: "i = Done ∨ i = Processing"
      using init_Val_PD[OF init] by auto
    show ?thesis
    proof(rule eval_cases(8)[OF acc]) ― ‹ SFAcc ›
      fix t sha sfs v ha la
      assume "s₁ = (ha, la, sha)" and "e' = Val v"
         and "s' = (ha, la, sha)" and "P ⊨ C has F,Static:t in D"
         and "sha D = ⌊(sfs, Done)⌋" and "sfs F = ⌊v⌋"
      then show ?thesis using SFAccInit SFAccInitRed.hyps(2) init by auto
    next
      fix t sha ha la v' h' l' sh' sfs i' v
      assume s₁a: "s₁ = (ha, la, sha)" and e': "e' = Val v"
         and s': "s' = (h', l', sh')" and field: "P ⊨ C has F,Static:t in D"
         and "∀sfs. sha D ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT D ([D],False) ← unit,(ha, la, sha)⟩ ==> ⟨Val v',(h', l', sh')⟩"
         and shD': "sh' D = ⌊(sfs, i')⌋" and sfsF: "sfs F = ⌊v⌋"
      then have i: "i = Processing" using iDP shD s₁ by simp
      then have "(h', l', sh') = (ha, la, sha)" using init' init_ProcessingE s₁ s₁a shD by blast
      then show ?thesis using SFAccInit SFAccInitRed.hyps(2) e' s' field init s₁a sfsF shD' by auto
    next
      fix t sha ha la a
      assume s₁a: "s₁ = (ha, la, sha)" and "e' = throw a"
         and "P ⊨ C has F,Static:t in D" and "∀sfs. sha D ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT D ([D],False) ← unit,(ha, la, sha)⟩ ==> ⟨throw a,s'⟩"
      then have i: "i = Processing" using iDP shD s₁ by simp
      then show ?thesis using init' init_ProcessingE s₁ s₁a shD by blast
    next
      assume "∀b t. ¬ P ⊨ C has F,b:t in D"
      then show ?thesis using SFAccInitRed.hyps(1) by blast
    next
      fix t assume field: "P ⊨ C has F,NonStatic:t in D"
      then show ?thesis using has_field_fun[OF SFAccInitRed.hyps(1) field] by simp
    qed
  next
    fix e assume e': "e' = throw e"
     and init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh)⟩ ==> ⟨throw e,s'⟩"
    obtain h' l' sh' where s': "s' = (h',l',sh')" by(cases s')
    then obtain sfs i where shC: "sh' D = ⌊(sfs, i)⌋" and iDP: "i = Error"
      using init_throw_PD[OF init] by auto
    then show ?thesis
      using SFAccInitRed.hyps(1) SFAccInitRed.hyps(2) SFAccInitThrow e' init by auto
  qed
next
  case RedSFAccNone thus ?case
    by(fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedSFAccNonStatic thus ?case
    by(fastforce elim: eval_cases intro: eval_evals.intros)
next
  case (FAssRed1 e s b e1 s1 b1 F D e₂)
  obtain h' l' sh' where "s'=(h',l',sh')" by(cases s')
  with FAssRed1 show ?case
    by(fastforce elim!: eval_cases(9)[where e₁=e1] intro: eval_evals.intros simp: val_no_step
                 intro!: FAss FAssNull FAssNone FAssStatic FAssThrow2)
next
  case FAssRed2
  obtain h' l' sh' where "s'=(h',l',sh')" by(cases s')
  with FAssRed2 show ?case
    by(auto elim!: eval_cases intro: eval_evals.intros
            intro!: FAss FAssNull FAssNone FAssStatic FAssThrow2 Val)
next
  case RedFAss
  thus ?case
    by (fastforce elim!: eval_cases intro: eval_evals.intros)
next
  case RedFAssNull
  thus ?case
    by (fastforce elim!: eval_cases intro: eval_evals.intros)
next
  case RedFAssNone
  then show ?case
    by(auto elim!: eval_cases intro: eval_evals.intros eval_finalId)
next
  case RedFAssStatic
  then show ?case
    by(auto elim!: eval_cases intro: eval_evals.intros eval_finalId)
next
  case (SFAssRed e s b e'' s'' b'' C F D)
  obtain h l sh where [simp]: "s = (h,l,sh)" by(cases s)
  obtain h' l' sh' where [simp]: "s'=(h',l',sh')" by(cases s')
  have "val_of e = None" using val_no_step SFAssRed.hyps(1) by(meson option.exhaust)
  then have bconf: "P,sh ⊨_b (e,b) √" using SFAssRed by simp
  show ?case using SFAssRed.prems(2) SFAssRed bconf
  proof cases
    case 2 with SFAssRed bconf show ?thesis by(auto intro!: SFAssInit)
  next
    case 3 with SFAssRed bconf show ?thesis by(auto intro!: SFAssInitThrow)
  qed(auto intro: eval_evals.intros intro!: SFAss SFAssInit SFAssNone SFAssNonStatic)
next
  case (RedSFAss C F t D sh sfs i sfs' v sh' h l)
  let ?sfs' = "sfs(F ↦ v)"
  have e':"e' = unit" and s':"s' = (h, l, sh(D ↦ (?sfs', i)))"
    using RedSFAss eval_cases(3) by fastforce+
  have "i = Done ∨ i = Processing" using RedSFAss by(clarsimp simp: bconf_def initPD_def)
  then show ?case
  proof(cases i)
    case Done then show ?thesis using RedSFAss e' s' SFAss Val by auto
  next
    case Processing
    then have shC': "∄sfs. sh D = Some(sfs,Done)" and shP: "sh D = Some(sfs,Processing)"
      using RedSFAss by simp+
    then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h,l,sh)⟩ ==> ⟨unit,(h,l,sh)⟩"
      by(simp add: InitFinal InitProcessing Val)
    have "P ⊨ ⟨C∙_sF{D} := Val v,(h, l, sh)⟩ ==> ⟨unit,(h,l,sh(D ↦ (?sfs', i)))⟩"
      using Processing by(auto intro: SFAssInit[OF Val RedSFAss.hyps(1) shC' init shP])
    then show ?thesis using e' s' by simp
  qed(auto)
next
  case (SFAssInitRed C F t D sh v h l)
  then have seq: "P ⊨ ⟨(INIT D ([D],False) ← unit);; C∙_sF{D} := Val v,(h, l, sh)⟩ ==> ⟨e',s'⟩"
    using eval_init_seq by simp
  then show ?case
  proof(rule eval_cases(14)) ― ‹ Seq ›
    fix v' s₁ assume init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh)⟩ ==> ⟨Val v',s₁⟩"
      and acc: "P ⊨ ⟨C∙_sF{D} := Val v,s₁⟩ ==> ⟨e',s'⟩"
    obtain h₁ l₁ sh₁ where s₁: "s₁ = (h₁,l₁,sh₁)" by(cases s₁)
    then obtain sfs i where shD: "sh₁ D = ⌊(sfs, i)⌋" and iDP: "i = Done ∨ i = Processing"
      using init_Val_PD[OF init] by auto
    show ?thesis
    proof(rule eval_cases(10)[OF acc]) ― ‹ SFAss ›
      fix va h₁ l₁ sh₁ t sfs
      assume e': "e' = unit" and s': "s' = (h₁, l₁, sh₁(D ↦ (sfs(F ↦ va), Done)))"
         and val: "P ⊨ ⟨Val v,s₁⟩ ==> ⟨Val va,(h₁, l₁, sh₁)⟩"
         and field: "P ⊨ C has F,Static:t in D" and shD': "sh₁ D = ⌊(sfs, Done)⌋"
      have "v = va" and "s₁ = (h₁, l₁, sh₁)" using eval_final_same[OF val] by auto
      then show ?thesis using SFAssInit field SFAssInitRed.hyps(2) shD' e' s' init val
        by (metis eval_final eval_finalId)
    next
      fix va h₁ l₁ sh₁ t v' h' l' sh' sfs i'
      assumee: "'=uit"s "s' = (h', l', sh'(D \mapsto> (sfs(F ↦))"
         and val: "P ⊨ ⟨1⟩ ==>Val va,(h₁, sh_"
         and field: "P ⊨ C has<ightarrow  < (g,g') ∈succs
         and init': " ⟨ unit,(h₁, sh ==>∠
         and shD': "sh' D = ⌊(sfs, i')⌋"
      have v: "v = vajava.lang.NullPointerException
      then have i: "i = Processing" using iDP shD s_\> ∀ set(succs g) ⟶ P g g 🚫 P g'"
     have^>, l₁, sh₁) = (h', l', sh')java.lang.NullPointerException
      then show ?thesis using SFAssInit SFAssInitRed.hyps(2) e' s' field init v s₁a shD' val
        by (metis eval_final eval_finalId)
    next
      fix va h₁ l₁ sh₁ t a
      assume "e' = throw a" and val: "P ⊨ ⟨Val v,s₁⟩ ==> ⟨Val va,(h₁, l₁, sh₁)⟩"
         and "P ⊨ C has F,Static:t in D" and nDone: "∀sfs. sh₁ D ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT D ([D],False) ← unit,(h₁, l₁, sh₁)⟩ ==> ⟨throw a,s'⟩"
      have v: "v = va" and s₁a: "s₁ = (h₁, l₁, sh₁)" using eval_final_same[OF val] by auto
      then have i: "i = Processing" using iDP shD s₁ nDone by simp
      then have "(h₁, l₁, sh₁) = s'" using init' init_ProcessingE s₁ s₁a shD by blast
      then show ?thesis using init' init_ProcessingE s₁ s₁a shD i by blast
    next
      fix e'' assume val:"P ⊨ ⟨Val v,s₁⟩ ==> ⟨throw e'',s'⟩"
      then show ?thesis using eval_final_same[OF val] by simp
    next
      assume "∀b t. ¬ P ⊨ C has F,b:t in D"
      then show ?thesis using SFAssInitRed.hyps(1) by blast
    next
      fix t assume field: "P ⊨ C has F,NonStatic:t in D"
      then show ?thesis using has_field_fun[OF SFAssInitRed.hyps(1) field] by simp
    qed
  next
    fix e assume e': "e' = throw e"
     and init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh)⟩ ==> ⟨throw e,s'⟩"
    obtain h' l' sh' where s': "s' = (h',l',sh')" by(cases s')
    then obtain sfs i where shC: "sh' D = ⌊(sfs, i)⌋" and iDP: "i = Error"
      using init_throw_PD[OF init] by auto
    then show ?thesis using SFAssInitRed.hyps(1) SFAssInitRed.hyps(2) SFAssInitThrow Val
      by (metis e' init)
  qed
next
  case (RedSFAssNone C F D v s b) then show ?case
    by(cases s) (auto elim!: eval_cases intro: eval_evals.intros eval_finalId)
next
  case (RedSFAssNonStatic C F t D v s b) then show ?case
    by(cases s) (auto elim!: eval_cases intro: eval_evals.intros eval_finalId)
next
  case CallObj
  note val_no_step[simp]
  from CallObj.prems(2) CallObj show ?case
  proof cases
    case 2 with CallObj show ?thesis by(fastforce intro!: CallParamsThrow)
  next
    case 3 with CallObj show ?thesis by(fastforce intro!: CallNull)
  next
    case 4 with CallObj show ?thesis by(fastforce intro!: CallNone)
  next
    case 5 with CallObj show ?thesis by(fastforce intro!: CallStatic)
  qed(fastforce intro!: CallObjThrow Call)+
next
  case (CallParams es s b es'' s'' b'' v M s')
  then obtain h' l' sh' where "s' = (h',l',sh')" by(cases s')
  with CallParams show ?case
   by(auto elim!: eval_cases intro!: CallNone eval_finalId CallStatic Val)
     (auto intro!: CallParamsThrow CallNull Call Val)
next
  case (RedCall h a C fs M Ts T pns body D vs l sh b)
  have "P ⊨ ⟨addr a,(h,l,sh)⟩ ==> ⟨addr a,(h,l,sh)⟩" by (rule eval_evals.intros)
  moreover
  have finals: "finals(map Val vs)" by simp
  with finals have "P ⊨ ⟨map Val vs,(h,l,sh)⟩ [==>] ⟨map Val vs,(h,l,sh)⟩"
    by (iprover intro: eval_finalsId)
  moreover have "h a = Some (C, fs)" using RedCall by simp
  moreover have "method": "P ⊨ C sees M,NonStatic: Ts→T = (pns, body) in D" by fact
  moreover have same_len₁: "length Ts = length pns"
   and this_distinct: "this ∉ set pns" and fv: "fv (body) ⊆ {this} ∪ set pns"
    using "method" wf by (fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  have same_len: "length vs = length pns" by fact
  moreover
  obtain l₂' where l₂': "l₂' = [this↦Addr a,pns[↦]vs]" by simp
  moreover
  obtain h₃ l₃ sh₃ where s': "s' = (h₃,l₃,sh₃)" by (cases s')
  have eval_blocks:
    "P ⊨ ⟨(blocks (this # pns, Class D # Ts, Addr a # vs, body)),(h,l,sh)⟩ ==> ⟨e',s'⟩" by fact
  hence id: "l₃ = l" using fv s' same_len₁ same_len
    by(fastforce elim: eval_closed_lcl_unchanged)
  from eval_blocks obtain l₃' where "P ⊨ ⟨body,(h,l₂',sh)⟩ ==> ⟨e',(h₃,l₃',sh₃)⟩"
  proof -
    from same_len₁ have "length(this#pns) = length(Class D#Ts)" by simp
    moreover from same_len₁ same_len
    have same_len₂: "length (this#pns) = length (Addr a#vs)" by simp
    moreover from eval_blocks
    have "P ⊨ ⟨blocks (this#pns,Class D#Ts,Addr a#vs,body),(h,l,sh)⟩
              ==>⟨e',(h₃,l₃,sh₃)⟩" using s' same_len₁ same_len₂ by simp
    ultimately obtain l''
      where "P ⊨ ⟨body,(h,l(this # pns[↦]Addr a # vs),sh)⟩==>⟨e',(h₃, l'',sh₃)⟩"
      by (blast dest:blocksEval)
    from eval_restrict_lcl[OF wf this fv] this_distinct same_len₁ same_len
    have "P ⊨ ⟨body,(h,[this # pns[↦]Addr a # vs],sh)⟩ ==>
               ⟨e',(h₃, l''|`(set(this#pns)),sh<sub>3</sub>)⟩" using wf method
      by(simp add:subset_insert_iff insert_Diff_if)
    thus ?thesis by(fastforce intro!:that simp add: l<sub>2</sub>')
  qed
  ultimately
  have "P ⊨ ⟨(addr a)∙M(map Val vs),(h,l,sh)⟩ ==> ⟨e',(h<sub>3</sub>,l,sh<sub>3</sub>)⟩" by (rule Call)
  with s' id show ?case by simp
next
  case RedCallNull
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros eval_finalsId)
next
  case (RedCallNone h a C fs M vs l sh b)
  then have tes: "THROW NoSuchMethodError = e' ∧ (h,l,sh) = s'"
    using eval_final_same by simp
  have "P ⊨ ⟨addr a,(h,l,sh)⟩ ==> ⟨addr a,(h,l,sh)⟩" and "P ⊨ ⟨map Val vs,(h,l,sh)⟩ [==>] ⟨map Val vs,(h,l,sh)⟩"
    using eval_finalId eval_finalsId by auto
  then show ?case using RedCallNone CallNone tes by auto
next
  case (RedCallStatic h a C fs M Ts T m D vs l sh b)
  then have tes: "THROW IncompatibleClassChangeError = e' ∧ (h,l,sh) = s'"
    using eval_final_same by simp
  have "P ⊨ ⟨addr a,(h,l,sh)⟩ ==> ⟨addr a,(h,l,sh)⟩" and "P ⊨ ⟨map Val vs,(h,l,sh)⟩ [==>] ⟨map Val vs,(h,l,sh)⟩"
    using eval_finalId eval_finalsId by auto
  then show ?case using RedCallStatic CallStatic tes by fastforce
next
  case (SCallParams es s b es'' s'' b' C M s')
  obtain h' l' sh' where s'[simp]: "s' = (h',l',sh')" by(cases s')
  obtain h l sh where s[simp]: "s = (h,l,sh)" by(cases s)
  have es: "map_vals_of es = None" using vals_no_step SCallParams.hyps(1) by (meson not_Some_eq)
  have bconf: "P,sh ⊨<sub>b</sub> (es,b) √" using s SCallParams.prems(1) by (simp add: bconf_SCall[OF es])
  from SCallParams.prems(2) SCallParams bconf show ?case
  proof cases
    case 2 with SCallParams bconf show ?thesis by(auto intro!: SCallNone)
  next
    case 3 with SCallParams bconf show ?thesis by(auto intro!: SCallNonStatic)
  next
    case 4 with SCallParams bconf show ?thesis by(auto intro!: SCallInitThrow)
  next
    case 5 with SCallParams bconf show ?thesis by(auto intro!: SCallInit)
  qed(auto intro!: SCallParamsThrow SCall)
next
  case (RedSCall C M Ts T pns body D vs s)
  then obtain h l sh where s:"s = (h,l,sh)" by(cases s)
  then obtain sfs i where shC: "sh D = ⌊(sfs, i)⌋" and "i = Done ∨ i = Processing"
   using RedSCall by(auto simp: bconf_def initPD_def dest: sees_method_fun)
  have finals: "finals(map Val vs)" by simp
  with finals have mVs: "P ⊨ ⟨map Val vs,(h,l,sh)⟩ [==>] ⟨map Val vs,(h,l,sh)⟩"
    by (iprover intro: eval_finalsId)
  obtain sfs i where shC: "sh D = ⌊(sfs, i)⌋"
   using RedSCall s by(auto simp: bconf_def initPD_def dest: sees_method_fun)
  then have iDP: "i = Done ∨ i = Processing" using RedSCall s
    by (auto simp: bconf_def initPD_def dest: sees_method_fun[OF RedSCall.hyps(1)])
  have "method": "P ⊨ C sees M,Static: Ts→T = (pns, body) in D" by fact
  have same_len<sub>1</sub>: "length Ts = length pns" and fv: "fv (body) ⊆ set pns"
    using "method" wf by (fastforce dest!:sees_wf_mdecl simp:wf_mdecl_def)+
  have same_len: "length vs = length pns" by fact
  obtain l<sub>2</sub>' where l<sub>2</sub>': "l<sub>2</sub>' = [pns[↦]vs]" by simp
  obtain h<sub>3</sub> l<sub>3</sub> sh<sub>3</sub> where s': "s' = (h<sub>3</sub>,l<sub>3</sub>,sh<sub>3</sub>)" by (cases s')
  have eval_blocks:
    "P ⊨ ⟨(blocks (pns, Ts, vs, body)),(h,l,sh)⟩ ==> ⟨e',s'⟩" using RedSCall.prems(2) s by simp
  hence id: "l<sub>3</sub> = l" using fv s' same_len<sub>1</sub> same_len
    by(fastforce elim: eval_closed_lcl_unchanged)
  from eval_blocks obtain l<sub>3</sub>' where body: "P ⊨ ⟨body,(h,l<sub>2</sub>',sh)⟩ ==> ⟨e',(h<sub>3</sub>,l<sub>3</sub>',sh<sub>3</sub>)⟩"
  proof -
    from eval_blocks
    have "P ⊨ ⟨blocks (pns,Ts,vs,body),(h,l,sh)⟩
              ==>⟨e',(h<sub>3</sub>,l<sub>3</sub>,sh<sub>3</sub>)⟩" using s' same_len same_len<sub>1</sub> by simp
    then obtain l''
      where "P ⊨ ⟨body,(h,l(pns[↦]vs),sh)⟩ ==> ⟨e',(h<sub>3</sub>, l'',sh<sub>3</sub>)⟩"
      by (blast dest:blocksEval[OF same_len<sub>1</sub>[THEN sym] same_len[THEN sym]])
    from eval_restrict_lcl[OF wf this fv] same_len<sub>1</sub> same_len
    have "P ⊨ ⟨body,(h,[pns[↦]vs],sh)⟩ ==> ⟨e',(h<sub>3</sub>, l''|`(set(pns)),sh₃)⟩" using wf method
      by(simp add:subset_insert_iff insert_Diff_if)
    thus ?thesis by(fastforce intro!:that simp add: l₂')
  qed
  show ?case using iDP
  proof(cases i)
    case Done
    then have shC': "sh D = ⌊(sfs, Done)⌋ ∨ M = clinit ∧ sh D = ⌊(sfs, Processing)⌋"
      using shC by simp
    have "P ⊨ ⟨C∙_sM(map Val vs),(h,l,sh)⟩ ==> ⟨e',(h₃,l,sh₃)⟩"
     by (rule SCall[OF mVs method shC' same_len l₂' body])
    with s s' id show ?thesis by simp
  next
    case Processing
    then have shC': "∄sfs. sh D = Some(sfs,Done)" and shP: "sh D = Some(sfs,Processing)"
      using shC by simp+
    then have init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h,l,sh)⟩ ==> ⟨unit,(h,l,sh)⟩"
      by(simp add: InitFinal InitProcessing Val)
    have "P ⊨ ⟨C∙_sM(map Val vs),(h,l,sh)⟩ ==> ⟨e',(h₃,l,sh₃)⟩"
    proof(cases "M = clinit")
      case False show ?thesis by(rule SCallInit[OF mVs method shC' False init same_len l₂' body])
    next
      case True
      then have shC': "sh D = ⌊(sfs, Done)⌋ ∨ M = clinit ∧ sh D = ⌊(sfs, Processing)⌋"
        using shC Processing by simp
      have "P ⊨ ⟨C∙_sM(map Val vs),(h,l,sh)⟩ ==> ⟨e',(h₃,l,sh₃)⟩"
       by (rule SCall[OF mVs method shC' same_len l₂' body])
      with s s' id show ?thesis by simp
    qed
    with s s' id show ?thesis by simp
  qed(auto)
next
  case (SCallInitRed C M Ts T pns body D sh vs h l)
  then have seq: "P ⊨ ⟨(INIT D ([D],False) ← unit);; C∙_sM(map Val vs),(h, l, sh)⟩ ==> ⟨e',s'⟩"
    using eval_init_seq by simp
  then show ?case
  proof(rule eval_cases(14)) ― ‹ Seq ›
    fix v' s₁ assume init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh)⟩ ==> ⟨Val v',s₁⟩"
      and call: "P ⊨ ⟨C∙_sM(map Val vs),s₁⟩ ==> ⟨e',s'⟩"
    obtain h₁ l₁ sh₁ where s₁: "s₁ = (h₁,l₁,sh₁)" by(cases s₁)
    then obtain sfs i where shD: "sh₁ D = ⌊(sfs, i)⌋" and iDP: "i = Done ∨ i = Processing"
      using init_Val_PD[OF init] by auto
    show ?thesis
    proof(rule eval_cases(12)[OF call]) ― ‹ SCall ›
      fix vsa ex es' assume "P ⊨ ⟨map Val vs,s₁⟩ [==>] ⟨map Val vsa @ throw ex # es',s'⟩"
      then show ?thesis using evals_finals_same by (meson finals_def map_Val_nthrow_neq)
    next
      assume "∀b Ts T a ba x. ¬ P ⊨ C sees M, b :  Ts→T = (a, ba) in x"
      then show ?thesis using SCallInitRed.hyps(1) by auto
    next
      fix Ts T m D assume "P ⊨ C sees M, NonStatic :  Ts→T = m in D"
      then show ?thesis using sees_method_fun[OF SCallInitRed.hyps(1)] by blast
    next
      fix vsa h1 l1 sh1 Ts T pns body D' a
      assume "e' = throw a" and vals: "P ⊨ ⟨map Val vs,s₁⟩ [==>] ⟨map Val vsa,(h1, l1, sh1)⟩"
         and method: "P ⊨ C sees M, Static :  Ts→T = (pns, body) in D'"
         and nDone: "∀sfs. sh1 D' ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT D' ([D'],False) ← unit,(h1, l1, sh1)⟩ ==> ⟨throw a,s'⟩"
      have vs: "vs = vsa" and s₁a: "s₁ = (h1, l1, sh1)"
        using evals_finals_same[OF _ vals] map_Val_eq by auto
      have D: "D = D'" using sees_method_fun[OF SCallInitRed.hyps(1) method] by simp
      then have i: "i = Processing" using iDP shD s₁ s₁a nDone by simp
      then show ?thesis using D init' init_ProcessingE s₁ s₁a shD by blast
    next
      fix vsa h1 l1 sh1 Ts T pns' body' D' v' h₂ l₂ sh₂ h₃ l₃ sh₃
      assume s': "s' = (h₃, l₂, sh₃)"
         and vals: "P ⊨ ⟨map Val vs,s₁⟩ [==>] ⟨map Val vsa,(h1, l1, sh1)⟩"
         and method: "P ⊨ C sees M, Static :  Ts→T = (pns', body') in D'"
         and nDone: "∀sfs. sh1 D' ≠ ⌊(sfs, Done)⌋"
         and init': "P ⊨ ⟨INIT D' ([D'],False) ← unit,(h1, l1, sh1)⟩ ==> ⟨Val v',(h₂, l₂, sh₂)⟩"
         and len: "length vsa = length pns'"
         and bstep: "P ⊨ ⟨body',(h₂, [pns' [↦] vsa], sh₂)⟩ ==> ⟨e',(h₃, l₃, sh₃)⟩"
      have vs: "vs = vsa" and s₁a: "s₁ = (h1, l1, sh1)"
        using evals_finals_same[OF _ vals] map_Val_eq by auto
      have D: "D = D'" and pns: "pns = pns'" and body: "body = body'"
        using sees_method_fun[OF SCallInitRed.hyps(1) method] by auto
      then have i: "i = Processing" using iDP shD s₁ s₁a nDone by simp
      then have s2: "(h₂, l₂, sh₂) = s₁" using D init' init_ProcessingE s₁ s₁a shD by blast
      then show ?thesis
        using eval_finalId SCallInit[OF eval_finalsId[of "map Val vs" P "(h,l,sh)"]
          SCallInitRed.hyps(1)] init init' len bstep nDone D pns body s' s₁ s₁a shD vals vs
          SCallInitRed.hyps(2-3) s2 by auto
    next
      fix vsa h₂ l₂ sh₂ Ts T pns' body' D' sfs h₃ l₃ sh₃
      assume s': "s' = (h₃, l₂, sh₃)" and vals: "P ⊨ ⟨map Val vs,s₁⟩ [==>] ⟨map Val vsa,(h₂, l₂, sh₂)⟩"
         and method: "P ⊨ C sees M, Static :  Ts→T = (pns', body') in D'"
         and "sh₂ D' = ⌊(sfs, Done)⌋ ∨ M = clinit ∧ sh₂ D' = ⌊(sfs, Processing)⌋"
         and len: "length vsa = length pns'"
         and bstep: "P ⊨ ⟨body',(h₂, [pns' [↦] vsa], sh₂)⟩ ==> ⟨e',(h₃, l₃, sh₃)⟩"
      have vs: "vs = vsa" and s₁a: "s₁ = (h₂, l₂, sh₂)"
        using evals_finals_same[OF _ vals] map_Val_eq by auto
      have D: "D = D'" and pns: "pns = pns'" and body: "body = body'"
        using sees_method_fun[OF SCallInitRed.hyps(1) method] by auto
      then show ?thesis using SCallInit[OF eval_finalsId[of "map Val vs" P "(h,l,sh)"]
        SCallInitRed.hyps(1)] bstep SCallInitRed.hyps(2-3) len s' s₁a vals vs init by auto
    qed
  next
    fix e assume e': "e' = throw e"
     and init: "P ⊨ ⟨INIT D ([D],False) ← unit,(h, l, sh)⟩ ==> ⟨throw e,s'⟩"
    obtain h' l' sh' where s': "s' = (h',l',sh')" by(cases s')
    then obtain sfs i where shC: "sh' D = ⌊(sfs, i)⌋" and iDP: "i = Error"
      using init_throw_PD[OF init] by auto
    then show ?thesis using SCallInitRed.hyps(2-3) init e'
      SCallInitThrow[OF eval_finalsId[of "map Val vs" _] SCallInitRed.hyps(1)]
     by auto
  qed
next
  case (RedSCallNone C M vs s b)
  then have tes: "THROW NoSuchMethodError = e' ∧ s = s'"
    using eval_final_same by simp
  have "P ⊨ ⟨map Val vs,s⟩ [==>] ⟨map Val vs,s⟩" using eval_finalsId by simp
  then show ?case using RedSCallNone eval_evals.SCallNone tes by auto
next
  case (RedSCallNonStatic C M Ts T m D vs s b)
  then have tes: "THROW IncompatibleClassChangeError = e' ∧ s = s'"
    using eval_final_same by simp
  have "P ⊨ ⟨map Val vs,s⟩ [==>] ⟨map Val vs,s⟩" using eval_finalsId by simp
  then show ?case using RedSCallNonStatic eval_evals.SCallNonStatic tes by auto
next
  case InitBlockRed
  thus ?case
    by (fastforce elim!: eval_cases intro: eval_evals.intros eval_finalId
                  simp: assigned_def map_upd_triv fun_upd_same)
next
  case (RedInitBlock V T v u s b)
  then have "P ⊨ ⟨Val u,s⟩ ==> ⟨e',s'⟩" by simp
  then obtain s': "s'=s" and e': "e'=Val u" by cases simp
  obtain h l sh where s: "s=(h,l,sh)" by (cases s)
  have "P ⊨ ⟨{V:T :=Val v; Val u},(h,l,sh)⟩ ==> ⟨Val u,(h, (l(V↦v))(V:=l V), sh)⟩"
    by (fastforce intro!: eval_evals.intros)
  then have "P ⊨ ⟨{V:T := Val v; Val u},s⟩ ==> ⟨e',s'⟩" using s s' e' by simp
  then show ?case by simp
next
  case BlockRedNone
  thus ?case
    by (fastforce elim!: eval_cases intro: eval_evals.intros
                 simp add: fun_upd_same fun_upd_idem)
next
  case BlockRedSome
  thus ?case
    by (fastforce elim!: eval_cases intro: eval_evals.intros
                 simp add: fun_upd_same fun_upd_idem)
next
 case (RedBlock V T v s b)
 then have "P ⊨ ⟨Val v,s⟩ ==> ⟨e',s'⟩" by simp
 then obtain s': "s'=s" and e': "e'=Val v"
    by cases simp
  obtain h l sh where s: "s=(h,l,sh)" by (cases s)
 have "P ⊨ ⟨Val v,(h,l(V:=None),sh)⟩ ==> ⟨Val v,(h,l(V:=None),sh)⟩"
   by (rule eval_evals.intros)
 hence "P ⊨ ⟨{V:T;Val v},(h,l,sh)⟩ ==> ⟨Val v,(h,(l(V:=None))(V:=l V),sh)⟩"
   by (rule eval_evals.Block)
 then have "P ⊨ ⟨{V:T; Val v},s⟩ ==> ⟨e',s'⟩" using s s' e' by simp
 then show ?case by simp
next
  case (SeqRed e s b e1 s1 b1 e₂) show ?case
  proof(cases "val_of e")
    case None show ?thesis
    proof(cases "lass_val_of e")
      case lNone:None
      then have bconf: "P,shp s ⊨_b (e,b) √" using SeqRed.prems(1) None by simp
      then show ?thesis using SeqRed using seq_ext by fastforce
    next
      case (Some p)
      obtain V' v' where p: "p = (V',v')" and e: "e = V':=Val v'"
        using lass_val_of_spec[OF Some] by(cases p, auto)
      obtain h l sh h' l' sh' where s: "s = (h,l,sh)" and s1: "s1 = (h',l',sh')" by(cases s, cases s1)
      then have red: "P ⊨ ⟨e,(h,l,sh),b⟩ → ⟨e1,(h',l',sh'),b1⟩" using SeqRed.hyps(1) by simp
      then have s₁': "e1 = unit ∧ h' = h ∧ l' = l(V' ↦ v') ∧ sh' = sh"
        using lass_val_of_red[OF Some red] p e by simp
      then have eval: "P ⊨ ⟨e,s⟩ ==> ⟨e1,s1⟩" using e s s1 LAss Val by auto
      then show ?thesis
        by (metis SeqRed.prems(2) eval_final eval_final_same seq_ext)
    qed
  next
    case (Some a) then show ?thesis using SeqRed.hyps(1) val_no_step by blast
  qed
next
  case RedSeq
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case CondRed
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros simp: val_no_step)
next
  case RedCondT
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedCondF
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedWhile
  thus ?case
    by (auto simp add: unfold_while intro:eval_evals.intros elim:eval_cases)
next
  case ThrowRed then show ?case by(fastforce elim: eval_cases simp: eval_evals.intros)
next
  case RedThrowNull
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case TryRed thus ?case
    by(fastforce elim: eval_cases intro: eval_evals.intros)
next
  case RedTryCatch
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case (RedTryFail s a D fs C V e₂ b)
  thus ?case
    by (cases s)(auto elim!: eval_cases intro: eval_evals.intros)
next
  case ListRed1
  thus ?case
    by (fastforce elim: evals_cases intro: eval_evals.intros simp: val_no_step)
next
  case ListRed2
  thus ?case
    by (fastforce elim!: evals_cases eval_cases
                 intro: eval_evals.intros eval_finalId)
next
  case (RedInit e1 C b s1 b') then show ?case using InitFinal by simp
next
  case (InitNoneRed sh C C' Cs e h l b)
  show ?case using InitNone InitNoneRed.hyps InitNoneRed.prems(2) by auto
next
  case (RedInitDone sh C sfs C' Cs e h l b)
  show ?case using InitDone RedInitDone.hyps RedInitDone.prems(2) by auto
next
  case (RedInitProcessing sh C sfs C' Cs e h l b)
  show ?case using InitProcessing RedInitProcessing.hyps RedInitProcessing.prems(2) by auto
next
  case (RedInitError sh C sfs C' Cs e h l b)
  show ?case using InitError RedInitError.hyps RedInitError.prems(2) by auto
next
  case (InitObjectRed sh C sfs sh' C' Cs e h l b) show ?case using InitObject InitObjectRed by auto
next
  case (InitNonObjectSuperRed sh C sfs D r sh' C' Cs e h l b)
  show ?case using InitNonObject InitNonObjectSuperRed by auto
next
  case (RedInitRInit C' C Cs e h l sh b)
  show ?case using InitRInit RedInitRInit by auto
next
  case (RInitRed e s b e'' s'' b'' C Cs e₀)
  then have IH: "∧e' s'. P ⊨ ⟨e'',s''⟩ ==> ⟨e',s'⟩ ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩" by simp
  show ?case using RInitRed rinit_ext[OF IH] by simp
next
  case (RedRInit sh C sfs i sh' C' Cs v e h l b s' e')
  then have init: "P ⊨ ⟨(INIT C' (Cs,True) ← e), (h, l, sh(C ↦ (sfs, Done)))⟩ ==> ⟨e',s'⟩"
    using RedRInit by simp
  then show ?case using RInit RedRInit.hyps(1) RedRInit.hyps(3) Val by fastforce
next
  case BinOpThrow2
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case FAssThrow2
  thus ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case SFAssThrow
  then show ?case
    by (fastforce elim: eval_cases intro: eval_evals.intros)
next
  case (CallThrowParams es vs e es' v M s b)
  have val: "P ⊨ ⟨Val v,s⟩ ==> ⟨Val v,s⟩" by (rule eval_evals.intros)
  have eval_e: "P ⊨ ⟨throw (e),s⟩ ==> ⟨e',s'⟩" using CallThrowParams by simp
  then obtain xa where e': "e' = Throw xa" by (cases) (auto dest!: eval_final)
  with list_eval_Throw [OF eval_e]
  have vals: "P ⊨ ⟨es,s⟩ [==>] ⟨map Val vs @ Throw xa # es',s'⟩"
    using CallThrowParams.hyps(1) eval_e list_eval_Throw by blast
  then have "P ⊨ ⟨Val v∙M(es),s⟩ ==> ⟨Throw xa,s'⟩"
   using eval_evals.CallParamsThrow[OF val vals] by simp
  thus ?case using e' by simp
next
  case (SCallThrowParams es vs e es' C M s b)
  have eval_e: "P ⊨ ⟨throw (e),s⟩ ==> ⟨e',s'⟩" using SCallThrowParams by simp
  then obtain xa where e': "e' = Throw xa" by (cases) (auto dest!: eval_final)
  then have "P ⊨ ⟨es,s⟩ [==>] ⟨map Val vs @ Throw xa # es',s'⟩"
    using SCallThrowParams.hyps(1) eval_e list_eval_Throw by blast
  then have "P ⊨ ⟨C∙_sM(es),s⟩ ==> ⟨Throw xa,s'⟩"
    by (rule eval_evals.SCallParamsThrow)
  thus ?case using e' by simp
next
  case (BlockThrow V T a s b)
  then have "P ⊨ ⟨Throw a, s⟩ ==> ⟨e',s'⟩" by simp
  then obtain s': "s' = s" and e': "e' = Throw a"
    by cases (auto elim!:eval_cases)
  obtain h l sh where s: "s=(h,l,sh)" by (cases s)
  have "P ⊨ ⟨Throw a, (h,l(V:=None),sh)⟩ ==> ⟨Throw a, (h,l(V:=None),sh)⟩"
    by (simp add:eval_evals.intros eval_finalId)
  hence "P⊨⟨{V:T;Throw a},(h,l,sh)⟩ ==> ⟨Throw a, (h,(l(V:=None))(V:=l V),sh)⟩"
    by (rule eval_evals.Block)
  then have "P ⊨ ⟨{V:T; Throw a},s⟩ ==> ⟨e',s'⟩" using s s' e' by simp
  then show ?case by simp
next
  case (InitBlockThrow V T v a s b)
  then have "P ⊨ ⟨Throw a,s⟩ ==> ⟨e',s'⟩" by simp
  then obtain s': "s' = s" and e': "e' = Throw a"
    by cases (auto elim!:eval_cases)
  obtain h l sh where s: "s = (h,l,sh)" by (cases s)
  have "P ⊨ ⟨{V:T :=Val v; Throw a},(h,l,sh)⟩ ==> ⟨Throw a, (h, (l(V↦v))(V:=l V),sh)⟩"
    by(fastforce intro:eval_evals.intros)
  then have "P ⊨ ⟨{V:T := Val v; Throw a},s⟩ ==> ⟨e',s'⟩" using s s' e' by simp
  then show ?case by simp
next
  case (RInitInitThrow sh C sfs i sh' a D Cs e h l b)
  have IH: "∧e' s'. P ⊨ ⟨RI (D,Throw a) ; Cs ← e,(h, l, sh(C ↦ (sfs, Error)))⟩ ==> ⟨e',s'⟩ ==>
    P ⊨ ⟨RI (C,Throw a) ; D # Cs ← e,(h, l, sh)⟩ ==> ⟨e',s'⟩"
    using RInitInitFail[OF eval_finalId] RInitInitThrow by simp
  then show ?case using RInitInitThrow.hyps(2) RInitInitThrow.prems(2) by auto
next
  case (RInitThrow sh C sfs i sh' a e h l b)
  then have e': "e' = Throw a" and s': "s' = (h,l,sh')"
    using eval_final_same final_def by fastforce+
  show ?case using RInitFailFinal RInitThrow.hyps(1) RInitThrow.hyps(2) e' eval_finalId s' by auto
qed(auto elim: eval_cases simp: eval_evals.intros)
(*>*)

(*<*)
(* ... und wieder anschalten: *)
declare split_paired_All [simp] split_paired_Ex [simp]
(*>*)

text ‹ Its extension to @{text"→*"}: ›

lemma extend_eval:
assumes wf: "wwf_J_prog P"
shows "[ P ⊨ ⟨e,s,b⟩ →* ⟨e'',s'',b''⟩; P ⊨ ⟨e'',s''⟩ ==> ⟨e',s'⟩;
         iconf (shp s) e; P,shp s ⊨_b (e::expr,b) √ ]
  ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩"
(*<*)
proof (induct rule: converse_rtrancl_induct3)
  case refl then show ?case by simp
next
  case (step e1 s1 b1 e2 s2 b2)
  then have ic: "iconf (shp s2) e2" using Red_preserves_iconf local.wf by blast
  then have ec: "P,shp s2 ⊨_b (e2,b2) √"
    using Red_preserves_bconf local.wf step.hyps(1) step.prems(2) step.prems(3) by blast
  show ?case using step ic ec extend_1_eval[OF wf step.hyps(1)] by simp
qed
(*>*)


lemma extend_evals:
assumes wf: "wwf_J_prog P"
shows "[ P ⊨ ⟨es,s,b⟩ [→]* ⟨es'',s'',b''⟩; P ⊨ ⟨es'',s''⟩ [==>] ⟨es',s'⟩;
         iconfs (shp s) es; P,shp s ⊨_b (es::expr list,b) √ ]
  ==> P ⊨ ⟨es,s⟩ [==>] ⟨es',s'⟩"
(*<*)
proof (induct rule: converse_rtrancl_induct3)
  case refl then show ?case by simp
next
  case (step es1 s1 b1 es2 s2 b2)
  then have ic: "iconfs (shp s2) es2" using Reds_preserves_iconf local.wf by blast
  then have ec: "P,shp s2 ⊨_b (es2,b2) √"
    using Reds_preserves_bconf local.wf step.hyps(1) step.prems(2) step.prems(3) by blast
  show ?case using step ic ec extend_1_evals[OF wf step.hyps(1)] by simp
qed
(*>*)

text ‹ Finally, small step semantics can be simulated by big step semantics:
\<close>

theorem
assumes wf: "  P"
  small_by_big:
 "[P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩; iconf (shp s) e; P,shp s ⊨_b (e,b) √; final e']
 ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩"
  "[P ⊨ ⟨es,s,b⟩ [→]* ⟨es',s',b'⟩; iconfs (shp s) es; P,shp s ⊨_b (es,b) √; finals es']
 ==> P ⊨ ⟨es,s⟩ [==>] ⟨es',s'⟩"
(*<*)
proof -
  note wf 
  moreover assume "P ⊨ ⟨e,s,b⟩ →* ⟨e',s',b'⟩"
  moreover assume "final e'"
  then have "P ⊨ ⟨e',s'⟩ ==> ⟨e',s'⟩"
    by (simp add: eval_finalId)
  moreover assume "iconf (shp s) e"
  moreover assume "P,shp s ⊨_b (e,b) √"
  ultimately show "P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩"
    by (rule extend_eval)
next
  assume fins: "finals es'"
  note wf 
  moreover assume "P ⊨ ⟨es,s,b⟩ [→]* ⟨es',s',b'⟩"
  moreover have "P ⊨ ⟨es',s'⟩ [==>] ⟨es',s'⟩" using fins
    by (rule eval_finalsId)
  moreover assume "iconfs (shp s) es"
  moreover assume "P,shp s ⊨_b (es,b) √"
  ultimately show "P ⊨ ⟨es,s⟩ [==>] ⟨es',s'⟩"
    by (rule extend_evals)
qed
(*>*)

subsection "Equivalence"

text‹ And now, the crowning achievement: ›

corollary big_iff_small:
"[ wwf_J_prog P; iconf (shp s) e; P,shp s ⊨_b (e::expr,b) √ ]
  ==> P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩ = (P ⊨ ⟨e,s,b⟩ →* ⟨e',s',False⟩ ∧ final e')"
(*<*)by(blast dest: big_by_small eval_final small_by_big)(*>*)

corollary big_iff_small_WT:
  "wwf_J_prog P ==> P,E ⊨ e::T ==> P,shp s ⊨_b (e,b) √ ==>
  P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩ = (P ⊨ ⟨e,s,b⟩ →* ⟨e',s',False⟩ ∧ final e')"
(*<*)by(blast dest: big_iff_small WT_nsub_RI nsub_RI_iconf)(*>*)


subsection ‹ Lifting type safety to @{text"==>"} ›

text‹ \dots and now to the big step semantics, just for fun. ›

lemma eval_preserves_sconf:
fixes s::state and s'::state
assumes  "wf_J_prog P" and "P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩" and "iconf (shp s) e"
 and "P,E ⊨ e::T" and "P,E ⊨ s√"
shows "P,E ⊨ s'√"
(*<*)
proof -
  have "P,shp s ⊨_b (e,False) √" by(simp add: bconf_def)
  with assms show ?thesis
    by(blast intro:Red_preserves_sconf Red_preserves_iconf Red_preserves_bconf big_by_small
                   WT_implies_WTrt wf_prog_wwf_prog)
qed
(*>*)


lemma eval_preserves_type:
fixes s::state
assumes wf: "wf_J_prog P"
 and "P ⊨ ⟨e,s⟩ ==> ⟨e',s'⟩" and "P,E ⊨ s√" and "iconf (shp s) e" and "P,E ⊨ e::T"
shows "∃T'. P ⊨ T' ≤ T ∧ P,E,hp s',shp s' ⊨ e':T'"
(*<*)
proof -
  have "P,shp s ⊨_b (e,False) √" by(simp add: bconf_def)
  with assms show ?thesis by(blast dest:big_by_small[OF wf_prog_wwf_prog[OF wf]]
                                        WT_implies_WTrt Red_preserves_type[OF wf])
qed
(*>*)


end