program-correctness-prover

Program Correctness Prover

Generate formal proofs establishing correctness of imperative programs.

Overview

This skill takes imperative program code with formal specifications (preconditions and postconditions) and generates complete correctness proofs in Isabelle or Coq using Hoare logic. It handles loop invariant generation, verification condition generation, and proof construction for both partial and total correctness.

How to Use

Provide:

1. Program code: Imperative program (assignments, conditionals, loops)
2. Specification: Precondition and postcondition
3. Target system: Isabelle or Coq
4. Correctness type: Partial or total correctness

The skill will generate:

• Loop invariants (if needed)
• Verification conditions
• Complete formal proof
• Termination argument (for total correctness)

Verification Workflow

Step 1: Analyze Program Structure

Identify program components:

• Assignments: x := E
• Sequences: C1; C2
• Conditionals: if B then C1 else C2
• Loops: while B do C

Step 2: Generate Loop Invariants

For each loop, construct an invariant that:

1. Holds initially: Precondition implies invariant
2. Preserved by loop body: {I ∧ B} C {I}
3. Implies postcondition: I ∧ ¬B ⟹ Q

Strategies:

• Generalize postcondition by replacing constants with loop variables
• Express partial computation at iteration i
• Maintain relationships between variables

Step 3: Generate Verification Conditions

Apply Hoare logic rules to generate VCs:

Assignment: {P[E/x]} x := E {P}

Sequence: Chain intermediate conditions

Conditional: Prove both branches

Loop: Prove initialization, preservation, and termination

Step 4: Construct Proof

Build formal proof in target system:

• Apply Hoare logic rules
• Prove each verification condition
• Use simplification and automation where possible

Step 5: Add Termination Argument (Total Correctness)

Provide variant function V that:

• Is non-negative when loop condition holds
• Strictly decreases each iteration

Example: Sum of Array

Program:

sum := 0;
i := 0;
while i < n do
  sum := sum + a[i];
  i := i + 1
done

Specification:

• Precondition: n ≥ 0
• Postcondition: sum = Σ(a[0..n-1])

Analysis:

• Loop accumulates sum of array elements
• Loop counter i ranges from 0 to n

Loop Invariant:

I: sum = Σ(a[0..i-1]) ∧ 0 ≤ i ≤ n

Verification Conditions:

1. Initialization: n ≥ 0 ⟹ 0 = Σ(a[0..-1]) ∧ 0 ≤ 0 ≤ n
2. Simplifies to: n ≥ 0 ⟹ 0 = 0 ∧ 0 ≤ n ✓

1. Preservation: {I ∧ i < n} sum := sum + a[i]; i := i + 1 {I}
2. WP: sum + a[i] = Σ(a[0..i]) ∧ 0 ≤ i + 1 ≤ n
3. Verify: From I and i < n, this holds ✓

1. Postcondition: I ∧ ¬(i < n) ⟹ sum = Σ(a[0..n-1])
2. From I and i ≥ n and i ≤ n, get i = n
3. So sum = Σ(a[0..n-1]) ✓

1. Termination (total correctness): V = n - i
2. Initially: V = n ≥ 0 ✓
3. Decreases: i := i + 1 makes V' = V - 1 < V ✓
4. Bounded: i ≤ n ⟹ V ≥ 0 ✓

Isabelle Proof (abbreviated):

lemma sum_array_partial:
  "⦃λs. s ''n'' ≥ 0⦄
   sum := 0;; i := 0;;
   While (λs. s ''i'' < s ''n'')
   Do (sum := (λs. s ''sum'' + s ''a'' (s ''i''));;
       i := (λs. s ''i'' + 1))
   ⦃λs. s ''sum'' = (∑j<s ''n''. s ''a'' j)⦄"
proof -
  define I where "I = (λs. s ''sum'' = (∑j<s ''i''. s ''a'' j) ∧
                            0 ≤ s ''i'' ∧ s ''i'' ≤ s ''n'')"

  (* Initialization *)
  have "⦃λs. s ''n'' ≥ 0⦄ sum := 0;; i := 0 ⦃I⦄"
    unfolding I_def by (auto intro: hoare_seq hoare_asgn)

  (* Loop body preserves invariant *)
  moreover have "⦃λs. I s ∧ s ''i'' < s ''n''⦄
                 sum := (λs. s ''sum'' + s ''a'' (s ''i''));;
                 i := (λs. s ''i'' + 1)
                 ⦃I⦄"
    unfolding I_def by (auto intro: hoare_seq hoare_asgn)

  (* Apply while rule *)
  ultimately have "⦃λs. s ''n'' ≥ 0⦄
                   sum := 0;; i := 0;;
                   While (λs. s ''i'' < s ''n'')
                   Do (sum := (λs. s ''sum'' + s ''a'' (s ''i''));;
                       i := (λs. s ''i'' + 1))
                   ⦃λs. I s ∧ ¬(s ''i'' < s ''n'')⦄"
    by (auto intro: hoare_seq hoare_while)

  (* Postcondition follows from invariant *)
  then show ?thesis
    unfolding I_def by (rule hoare_conseq) auto
qed

Coq Proof (abbreviated):

Theorem sum_array_partial : forall n a,
  n >= 0 ->
  {{ fun st => st N = n /\ n >= 0 }}
  sum ::= 0;;
  i ::= 0;;
  while i < N do
    sum ::= sum + a[i];;
    i ::= i + 1
  done
  {{ fun st => st sum = sum_array a n }}.
Proof.
  intros n a Hn.
  remember (fun st => st sum = sum_array a (st i) /\
                      0 <= st i /\ st i <= st N) as I.

  (* Initialization *)
  eapply hoare_seq. apply hoare_asgn.
  eapply hoare_seq. apply hoare_asgn.

  (* Loop *)
  eapply hoare_consequence_post.
  - apply hoare_while.
    (* Loop body *)
    eapply hoare_seq. apply hoare_asgn.
    eapply hoare_consequence_pre.
    + apply hoare_asgn.
    + intros st [HI Hcond]. subst I. simpl.
      destruct HI as [Hsum [Hi1 Hi2]].
      split; [|split]; try lia.
      rewrite Hsum. unfold sum_array. lia.
  - (* Postcondition *)
    intros st [HI Hcond]. subst I.
    destruct HI as [Hsum [Hi1 Hi2]].
    assert (st i = n) by lia.
    rewrite H. exact Hsum.
Qed.

Example: Maximum of Two Numbers

Program:

if x >= y then
  max := x
else
  max := y

Specification:

• Precondition: true
• Postcondition: max = max(x, y)

Analysis:

• Conditional with two branches
• No loops, so no invariants needed

Verification Conditions:

1. Then branch: {x ≥ y} max := x {max = max(x, y)}
2. WP: x = max(x, y)
3. Verify: x ≥ y ⟹ x = max(x, y) ✓

1. Else branch: {x < y} max := y {max = max(x, y)}
2. WP: y = max(x, y)
3. Verify: x < y ⟹ y = max(x, y) ✓

Isabelle Proof:

lemma max_correct:
  "⦃λs. True⦄
   If (λs. s ''x'' ≥ s ''y'')
   Then max := (λs. s ''x'')
   Else max := (λs. s ''y'')
   ⦃λs. s ''max'' = max (s ''x'') (s ''y'')⦄"
proof (rule hoare_if)
  show "⦃λs. s ''x'' ≥ s ''y''⦄
        max := (λs. s ''x'')
        ⦃λs. s ''max'' = max (s ''x'') (s ''y'')⦄"
    by (rule hoare_conseq[OF hoare_asgn]) simp
next
  show "⦃λs. ¬(s ''x'' ≥ s ''y'')⦄
        max := (λs. s ''y'')
        ⦃λs. s ''max'' = max (s ''x'') (s ''y'')⦄"
    by (rule hoare_conseq[OF hoare_asgn]) simp
qed

Coq Proof:

Example max_correct :
  {{ fun st => True }}
  if x >= y then
    max ::= x
  else
    max ::= y
  {{ fun st => st max = max (st x) (st y) }}.
Proof.
  apply hoare_if.
  - eapply hoare_consequence_pre.
    + apply hoare_asgn.
    + intros st H. simpl. lia.
  - eapply hoare_consequence_pre.
    + apply hoare_asgn.
    + intros st H. simpl. lia.
Qed.

Common Patterns

Pattern: Sequential Assignments

Program: x := E1; y := E2; z := E3

Strategy: Work backwards with weakest precondition

Pattern: Accumulation Loop

Program: result := init; while i < n do result := f(result, a[i]); i := i + 1

Invariant: result = fold(f, init, a[0..i-1]) ∧ 0 ≤ i ≤ n

Pattern: Search Loop

Program: found := false; while i < n && !found do if a[i] == target then found := true else i := i + 1

Invariant: (∀j. 0 ≤ j < i ⟹ a[j] ≠ target) ∧ 0 ≤ i ≤ n

Pattern: Nested Loops

Program: Outer loop with inner loop

Invariants: Outer invariant + inner invariant (may depend on outer variables)

Correctness Types

Partial Correctness

Definition: If precondition holds and program terminates, postcondition holds

Hoare triple: {P} C {Q}

What to prove:

• Initialization
• Preservation
• Postcondition follows from invariant

Total Correctness

Definition: If precondition holds, program terminates AND postcondition holds

Hoare triple: [P] C [Q] (square brackets)

What to prove:

• Everything from partial correctness
• Termination via variant function

**Variant requiremen