(* Author: Tobias Nipkow and Gerwin Klein *)

header "Compiler for IMP"

theory Compiler imports Big_Step Star

begin

subsection "List setup"

text {* 

  In the following, we use the length of lists as integers 

  instead of natural numbers. Instead of converting @{typ nat}

  to @{typ int} explicitly, we tell Isabelle to coerce @{typ nat}

  automatically when necessary.

*}

declare [[coercion_enabled]] 

declare [[coercion "int :: nat \<Rightarrow> int"]]

text {* 

  Similarly, we will want to access the ith element of a list, 

  where @{term i} is an @{typ int}.

*}

fun inth :: "'a list \<Rightarrow> int \<Rightarrow> 'a" (infixl "!!" 100) where

"(x # xs) !! n = (if n = 0 then x else xs !! (n - 1))"

text {*

  The only additional lemma we need about this function 

  is indexing over append:

*}

lemma inth_append [simp]:

  "0 \<le> n \<Longrightarrow>

  (xs @ ys) !! n = (if n < size xs then xs !! n else ys !! (n - size xs))"

by (induction xs arbitrary: n) (auto simp: algebra_simps)

subsection "Instructions and Stack Machine"

text_raw{*\snip{instrdef}{0}{1}{% *}

datatype instr = 

  LOADI int | LOAD vname | ADD | STORE vname |

  JMP int | JMPLESS int | JMPGE int

text_raw{*}%endsnip*}

type_synonym stack = "val list"

type_synonym config = "int \<times> state \<times> stack"

abbreviation "hd2 xs == hd(tl xs)"

abbreviation "tl2 xs == tl(tl xs)"

fun iexec :: "instr \<Rightarrow> config \<Rightarrow> config" where

"iexec instr (i,s,stk) = (case instr of

  LOADI n \<Rightarrow> (i+1,s, n#stk) |

  LOAD x \<Rightarrow> (i+1,s, s x # stk) |

  ADD \<Rightarrow> (i+1,s, (hd2 stk + hd stk) # tl2 stk) |

  STORE x \<Rightarrow> (i+1,s(x := hd stk),tl stk) |

  JMP n \<Rightarrow>  (i+1+n,s,stk) |

  JMPLESS n \<Rightarrow> (if hd2 stk < hd stk then i+1+n else i+1,s,tl2 stk) |

  JMPGE n \<Rightarrow> (if hd2 stk >= hd stk then i+1+n else i+1,s,tl2 stk))"

definition

  exec1 :: "instr list \<Rightarrow> config \<Rightarrow> config \<Rightarrow> bool"

     ("(_/ \<turnstile> (_ \<rightarrow>/ _))" [59,0,59] 60) 

where

  "P \<turnstile> c \<rightarrow> c' = 

  (\<exists>i s stk. c = (i,s,stk) \<and> c' = iexec(P!!i) (i,s,stk) \<and> 0 \<le> i \<and> i < size P)"

lemma exec1I [intro, code_pred_intro]:

  "c' = iexec (P!!i) (i,s,stk) \<Longrightarrow> 0 \<le> i \<Longrightarrow> i < size P

  \<Longrightarrow> P \<turnstile> (i,s,stk) \<rightarrow> c'"

by (simp add: exec1_def)

abbreviation 

  exec :: "instr list \<Rightarrow> config \<Rightarrow> config \<Rightarrow> bool" ("(_/ \<turnstile> (_ \<rightarrow>*/ _))" 50)

where

  "exec P \<equiv> star (exec1 P)"

declare star.step[intro]

lemmas exec_induct = star.induct [of "exec1 P", split_format(complete)]

code_pred exec1 by (metis exec1_def)

values

  "{(i,map t [''x'',''y''],stk) | i t stk.

    [LOAD ''y'', STORE ''x''] \<turnstile>

    (0, <''x'' := 3, ''y'' := 4>, []) \<rightarrow>* (i,t,stk)}"

subsection{* Verification infrastructure *}

text{* Below we need to argue about the execution of code that is embedded in

larger programs. For this purpose we show that execution is preserved by

appending code to the left or right of a program. *}

lemma iexec_shift [simp]: 

  "((n+i',s',stk') = iexec x (n+i,s,stk)) = ((i',s',stk') = iexec x (i,s,stk))"

by(auto split:instr.split)

lemma exec1_appendR: "P \<turnstile> c \<rightarrow> c' \<Longrightarrow> P@P' \<turnstile> c \<rightarrow> c'"

by (auto simp: exec1_def)

lemma exec_appendR: "P \<turnstile> c \<rightarrow>* c' \<Longrightarrow> P@P' \<turnstile> c \<rightarrow>* c'"

by (induction rule: star.induct) (fastforce intro: exec1_appendR)+

lemma exec1_appendL:

  fixes i i' :: int 

  shows

  "P \<turnstile> (i,s,stk) \<rightarrow> (i',s',stk') \<Longrightarrow>

   P' @ P \<turnstile> (size(P')+i,s,stk) \<rightarrow> (size(P')+i',s',stk')"

  unfolding exec1_def

  by (auto simp del: iexec.simps)

lemma exec_appendL:

  fixes i i' :: int 

  shows

 "P \<turnstile> (i,s,stk) \<rightarrow>* (i',s',stk')  \<Longrightarrow>

  P' @ P \<turnstile> (size(P')+i,s,stk) \<rightarrow>* (size(P')+i',s',stk')"

  by (induction rule: exec_induct) (blast intro!: exec1_appendL)+

text{* Now we specialise the above lemmas to enable automatic proofs of

@{prop "P \<turnstile> c \<rightarrow>* c'"} where @{text P} is a mixture of concrete instructions and

pieces of code that we already know how they execute (by induction), combined

by @{text "@"} and @{text "#"}. Backward jumps are not supported.

The details should be skipped on a first reading.

If we have just executed the first instruction of the program, drop it: *}

lemma exec_Cons_1 [intro]:

  "P \<turnstile> (0,s,stk) \<rightarrow>* (j,t,stk') \<Longrightarrow>

  instr#P \<turnstile> (1,s,stk) \<rightarrow>* (1+j,t,stk')"

by (drule exec_appendL[where P'="[instr]"]) simp

lemma exec_appendL_if[intro]:

  fixes i i' :: int

  shows

  "size P' <= i

   \<Longrightarrow> P \<turnstile> (i - size P',s,stk) \<rightarrow>* (i',s',stk')

   \<Longrightarrow> P' @ P \<turnstile> (i,s,stk) \<rightarrow>* (size P' + i',s',stk')"

by (drule exec_appendL[where P'=P']) simp

text{* Split the execution of a compound program up into the excution of its

parts: *}

lemma exec_append_trans[intro]:

  fixes i' i'' j'' :: int

  shows

"P \<turnstile> (0,s,stk) \<rightarrow>* (i',s',stk') \<Longrightarrow>

 size P \<le> i' \<Longrightarrow>

 P' \<turnstile>  (i' - size P,s',stk') \<rightarrow>* (i'',s'',stk'') \<Longrightarrow>

 j'' = size P + i''

 \<Longrightarrow>

 P @ P' \<turnstile> (0,s,stk) \<rightarrow>* (j'',s'',stk'')"

by(metis star_trans[OF exec_appendR exec_appendL_if])

declare Let_def[simp]

subsection "Compilation"

fun acomp :: "aexp \<Rightarrow> instr list" where

"acomp (N n) = [LOADI n]" |

"acomp (V x) = [LOAD x]" |

"acomp (Plus a1 a2) = acomp a1 @ acomp a2 @ [ADD]"

lemma acomp_correct[intro]:

  "acomp a \<turnstile> (0,s,stk) \<rightarrow>* (size(acomp a),s,aval a s#stk)"

by (induction a arbitrary: stk) fastforce+

fun bcomp :: "bexp \<Rightarrow> bool \<Rightarrow> int \<Rightarrow> instr list" where

"bcomp (Bc v) c n = (if v=c then [JMP n] else [])" |

"bcomp (Not b) c n = bcomp b (\<not>c) n" |

"bcomp (And b1 b2) c n =

 (let cb2 = bcomp b2 c n;

        m = (if c then size cb2 else (size cb2::int)+n);

      cb1 = bcomp b1 False m

  in cb1 @ cb2)" |

"bcomp (Less a1 a2) c n =

 acomp a1 @ acomp a2 @ (if c then [JMPLESS n] else [JMPGE n])"

value

  "bcomp (And (Less (V ''x'') (V ''y'')) (Not(Less (V ''u'') (V ''v''))))

     False 3"

lemma bcomp_correct[intro]:

  fixes n :: int

  shows

  "0 \<le> n \<Longrightarrow>

  bcomp b c n \<turnstile>

 (0,s,stk)  \<rightarrow>*  (size(bcomp b c n) + (if c = bval b s then n else 0),s,stk)"

proof(induction b arbitrary: c n)

  case Not

  from Not(1)[where c="~c"] Not(2) show ?case by fastforce

next

  case (And b1 b2)

  from And(1)[of "if c then size(bcomp b2 c n) else size(bcomp b2 c n) + n" 

                 "False"] 

       And(2)[of n  "c"] And(3) 

  show ?case by fastforce

qed fastforce+

fun ccomp :: "com \<Rightarrow> instr list" where

"ccomp SKIP = []" |

"ccomp (x ::= a) = acomp a @ [STORE x]" |

"ccomp (c\<^sub>1;;c\<^sub>2) = ccomp c\<^sub>1 @ ccomp c\<^sub>2" |

"ccomp (IF b THEN c\<^sub>1 ELSE c\<^sub>2) =

  (let cc\<^sub>1 = ccomp c\<^sub>1; cc\<^sub>2 = ccomp c\<^sub>2; cb = bcomp b False (size cc\<^sub>1 + 1)

   in cb @ cc\<^sub>1 @ JMP (size cc\<^sub>2) # cc\<^sub>2)" |

"ccomp (WHILE b DO c) =

 (let cc = ccomp c; cb = bcomp b False (size cc + 1)

  in cb @ cc @ [JMP (-(size cb + size cc + 1))])"

value "ccomp

 (IF Less (V ''u'') (N 1) THEN ''u'' ::= Plus (V ''u'') (N 1)

  ELSE ''v'' ::= V ''u'')"

value "ccomp (WHILE Less (V ''u'') (N 1) DO (''u'' ::= Plus (V ''u'') (N 1)))"

subsection "Preservation of semantics"

lemma ccomp_bigstep:

  "(c,s) \<Rightarrow> t \<Longrightarrow> ccomp c \<turnstile> (0,s,stk) \<rightarrow>* (size(ccomp c),t,stk)"

proof(induction arbitrary: stk rule: big_step_induct)

  case (Assign x a s)

  show ?case by (fastforce simp:fun_upd_def cong: if_cong)

next

  case (Seq c1 s1 s2 c2 s3)

  let ?cc1 = "ccomp c1"  let ?cc2 = "ccomp c2"

  have "?cc1 @ ?cc2 \<turnstile> (0,s1,stk) \<rightarrow>* (size ?cc1,s2,stk)"

    using Seq.IH(1) by fastforce

  moreover

  have "?cc1 @ ?cc2 \<turnstile> (size ?cc1,s2,stk) \<rightarrow>* (size(?cc1 @ ?cc2),s3,stk)"

    using Seq.IH(2) by fastforce

  ultimately show ?case by simp (blast intro: star_trans)

next

  case (WhileTrue b s1 c s2 s3)

  let ?cc = "ccomp c"

  let ?cb = "bcomp b False (size ?cc + 1)"

  let ?cw = "ccomp(WHILE b DO c)"

  have "?cw \<turnstile> (0,s1,stk) \<rightarrow>* (size ?cb,s1,stk)"

    using `bval b s1` by fastforce

  moreover

  have "?cw \<turnstile> (size ?cb,s1,stk) \<rightarrow>* (size ?cb + size ?cc,s2,stk)"

    using WhileTrue.IH(1) by fastforce

  moreover

  have "?cw \<turnstile> (size ?cb + size ?cc,s2,stk) \<rightarrow>* (0,s2,stk)"

    by fastforce

  moreover

  have "?cw \<turnstile> (0,s2,stk) \<rightarrow>* (size ?cw,s3,stk)" by(rule WhileTrue.IH(2))

  ultimately show ?case by(blast intro: star_trans)

qed fastforce+

end