Dafny - Violating Modifies when Calling in Loop - dynamic-arrays

The following is based off of Secure Foundations's dafny implementation of a Dynamic Array.
I'm trying to create a test method that when calling push_back, invokes extend_buffer. This requires a prefix: calling push_back enough times to fill it up so the next time it's called, the buffer is extended. With a default size of 16, the prefix would consist of calling push_back 15 times. I find that if I make the call 15 times it verifies, but if I instead try to call in a for loop, I get the error call may violate context's modifies clause.
class Vector<T> {
static const DEFAULT_SIZE := 16
var buffer : array<T>
var capacity : int
var size : int
predicate Valid()
reads this, buffer
{
capacity >= DEFAULT_SIZE
&& capacity as int == buffer.Length
&& 0 <= size < capacity
}
method extend_buffer(value: T)
requires Valid()
ensures Valid()
ensures fresh(buffer)
ensures size as int < capacity as int - 1
ensures forall i : int :: 0 <= i < old(size) ==> buffer[i] == old(buffer[i])
ensures size == old(size)
ensures capacity == old(capacity) as int * 2
ensures buffer.Length == old(buffer.Length) * 2
modifies this`capacity, this`buffer
{
var old_buffer := this.buffer;
var old_size := this.capacity;
capacity := old_size * 2;
buffer := newArrayFill(capacity, value);
var i:= 0;
while i < old_size
invariant Valid();
invariant capacity > old_size;
invariant i < capacity;
invariant i < old_size;
invariant fresh(buffer)
invariant size < capacity - 1;
invariant size == old(size)
invariant capacity == old(capacity) * 2
invariant forall k : int :: 0 <= k < i ==> buffer[k] == old_buffer[k] == old(buffer[k])
{
buffer[i] := old_buffer[i];
if i == old_size - 1 {
break;
}
i := i + 1;
}
}
method push_back(value:T)
requires Valid()
ensures Valid();
ensures old(size as int) < buffer.Length
ensures buffer[old(size)] == value
ensures size == old(size) + 1
ensures if old(size) + 1 == old(capacity) then fresh(buffer) else buffer == old(buffer)
ensures forall i : int :: 0 <= i < old(size) ==> buffer[i] == old(buffer[i])
ensures forall i : int :: size <= i < old(buffer.Length) ==> buffer[i] == old(buffer[i])
ensures if size == old(capacity) then fresh(buffer) else !fresh(buffer) && buffer == old(buffer)
modifies this, this.buffer, this`size
{
if (size + 1 == capacity)
{
extend_buffer(value);
}
buffer[size] := value;
size := size + 1;
}
method {:extern "Extern", "newArrayFill"} newArrayFill<T>(n: int, t: T) returns (ar: array<T>)
ensures ar.Length == n as int
ensures forall i | 0 <= i < n :: ar[i] == t
ensures fresh(ar)
constructor(default_val:T)
ensures Valid()
ensures fresh(buffer)
ensures size == 0
ensures capacity == DEFAULT_SIZE
ensures capacity as int == buffer.Length
{
size := 0;
capacity := DEFAULT_SIZE;
new;
buffer := newArrayFill(DEFAULT_SIZE, default_val);
}
}
method push_back_should_extend()
{
var arr := new Vector(0);
label L:
var oracleValue := 7;
for i : int := 0 to arr.capacity - 1
invariant arr.Valid()
{
arr.push_back(oracleValue);
}
}
I'm assuming the issue arises from push_back claiming it modifies this, which I feel is overstating what it actually modifies, but when I remove this, the error just moves to the call to extend_buffer.
Interestingly, adding in the following twostate:
twostate predicate sameBuffer(v: Vector)
reads v`buffer
{
v.buffer == old(v.buffer)
}
and then adding invariant sameBuffer#L(arr) to push_back_should_extend's for loop also doesn't verify, even though it's clear from ensures if old(size) + 1 == old(capacity) then fresh(buffer) else !fresh(buffer) && buffer == old(buffer) that the memory for buffer doesn't change throughout the prefix.
I feel this could be addressed by an inductive lemma, but while I understand the form of lemma's, I lack the ability to apply and derive them.

Adding
invariant fresh(arr.buffer)
to the for loop seems to fix it. Does that do what you want?

Related

Failed to verifying the occurrence of a value in an array with logic function

I tried to use Frama-c to prove the occurrence of true value in an array that is the same as a integer which used to record the number of true values. But the prove failed if I want to change some values false to true.
Is there any method to solve this problem?
(Frama-c 25.0 / Alt-Ergo 2.4.2 / CVC4 1.8 / Z3 4.8.6)
#include <stdio.h>
#include <stdlib.h>
#include <stdbool.h>
#define SIZE 150
bool table[SIZE] = {true};
int true_counter;
/*#
logic integer count_true(integer idx) =
idx<=0 ? 0 :
(table[idx-1]==true ? count_true(idx-1) + 1 : count_true(idx-1));
*/
/*#
requires table[0] == false;
requires true_counter == count_true(SIZE);
assigns table[0], true_counter;
ensures table[0] == true;
ensures true_counter == \old(true_counter) + 1;
*/
void ATEST(void) {
int countBF = 0;
int countAF = 0;
/*#
loop invariant 0 <= idx <= SIZE;
loop invariant 0 <= countBF == count_true(idx) <= idx;
loop assigns idx, countBF;
loop variant SIZE - idx;
*/
for(int idx=0; idx<SIZE; idx++) {
if(table[idx] == true) countBF += 1;
}
//# assert true_counter == countBF;
table[0] = true;
true_counter += 1;
/*#
loop invariant 0 <= idx <= SIZE;
loop invariant 0 <= countAF == count_true(idx) <= idx;
loop assigns idx, countAF;
loop variant SIZE - idx;
*/
for(int idx=0; idx<SIZE; idx++) {
if(table[idx] == true) countAF += 1;
}
//# assert true_counter == countAF;
//# assert countAF == countBF + 1;
}
[kernel] Parsing test.c (with preprocessing)
[rte:annot] annotating function ATEST
[wp] 33 goals scheduled
[wp] [Failed] Goal typed_ATEST_assert_2
Z3 4.8.6: Unknown (Qed:8ms) (cached)
CVC4 1.8: Timeout (Qed:8ms) (10s) (cached)
Alt-Ergo 2.4.2: Timeout (Qed:8ms) (10s) (cached)
[wp] [Cache] found:17
[wp] Proved goals: 32 / 33
Qed: 26 (0.84ms-7ms-24ms)
Alt-Ergo 2.4.2: 6 (7ms-13ms-27ms) (629) (interrupted: 1) (cached: 7)
CVC4 1.8: 4 (20ms-28ms-30ms) (11375) (interrupted: 1) (cached: 5)
Z3 4.8.6: 4 (10ms-20ms) (46252) (unknown: 1) (cached: 5)
The problem is that such a reasoning is not that direct. Here is what happen: when we write cell 0, WP creates a new memory whose properties are directly related to the old memory. The loop invariant of the first loop gives to the solver some information about the original memory, the loop invariant of the second loop gives information about the new memory. But for establishing the link between the two we need to learn something like "since only on value has changed, the remaining part has the same number of occurrences". Which is not possible with most SMT solvers.
For this particular example, we can be brutal and directly push the information in the invariant of the second loop:
/*#
loop invariant 0 <= idx <= SIZE;
loop invariant 0 <= countAF == count_true(idx) <= idx;
// added:
loop invariant idx >= 1 ==> countAF == 1 + count_true{Pre}(idx) <= idx;
loop assigns idx, countAF;
loop variant SIZE - idx;
*/
for(int idx=0; idx<SIZE; idx++) {
if(table[idx] == true) countAF += 1;
}
Which allows to create the link between the number of occurrences in the pre-state with the current number of occurrences. A more elegant solution is to dedicate a bit of ghost code so that it applies to any location:
/*#
requires 0 <= loc < SIZE ;
requires table[loc] == false;
requires true_counter == count_true(SIZE);
assigns table[loc], true_counter;
ensures table[loc] == true;
ensures true_counter == \old(true_counter) + 1;
*/
void ATEST(int loc) {
int countBF = 0;
int countAF = 0;
/*#
loop invariant 0 <= idx <= SIZE;
loop invariant 0 <= countBF == count_true(idx) <= idx;
loop assigns idx, countBF;
loop variant SIZE - idx;
*/
for(int idx=0; idx<SIZE; idx++) {
if(table[idx] == true) countBF += 1;
}
//# assert true_counter == countBF;
table[loc] = true;
true_counter += 1;
/*# ghost
/# loop invariant 0 <= i <= loc ;
loop invariant count_true(i) == count_true{Pre}(i);
loop assigns i;
loop variant loc - i ;
#/
for(int i = 0 ; i < loc ; i++);
/# loop invariant loc < i <= SIZE ;
loop invariant count_true(i) == 1 + count_true{Pre}(i);
loop assigns i;
loop variant SIZE - i ;
#/
for(int i = loc+1 ; i < SIZE ; i++);
*/
/*#
loop invariant 0 <= idx <= SIZE;
loop invariant 0 <= countAF == count_true(idx) <= idx;
loop assigns idx, countAF;
loop variant SIZE - idx;
*/
for(int idx=0; idx<SIZE; idx++) {
if(table[idx] == true) countAF += 1;
}
}
On can also express lemmas to handle the problem. For example the following lemmas can provide enough information to solvers so that they can finish the proof:
/*# lemma same_count{L1,L2}:
\forall integer size; 0<= size < SIZE ==>
(\forall integer i; 0 <= i < size ==> \at(table[i], L1) == \at(table[i],L2)) ==>
count_true{L1}(size) == count_true{L2}(size);
*/
/*# lemma same_but_one{L1,L2}:
\forall integer size; 0 <= size < SIZE ==>
\forall integer i_diff; 0 <= i_diff < size ==>
(\forall integer i; 0 <= i < size && i != i_diff ==> \at(table[i],L1) == \at(table[i],L2))
&& \at(table[i_diff],L1) == false && \at(table[i_diff],L2) == true
==>
count_true{L1}(size) + 1 == count_true{L2}(size);
*/
The first lemma states that an unchanged memory region keeps the same number of occurrences as before. The second states that when in a state a cell has true while in another it is false and all remaining cells are the same, the number of occurrences changes by one. These two lemmas can be verified via the induction tactic (see for example https://stackoverflow.com/a/73796135/4628125).
These two lemmas can be used directly by the solvers to get a proof for any location.

Failed to establish an invariant requiring the knowledge of the content of an array

I try to use Frama-C to prove the invariant below. With the precondition that the array clean has at least one "true" in the first half, the loop should terminate before the last iteration and hence i will never be increased to BLOCK_NUM (=1000). However, Frama-C seems to ignore the content of clean and failed to establish the loop invariant. Does anyone know how to fix this proof?
#include <stdio.h>
#include <stdlib.h>
#include <stdbool.h>
#include <assert.h>
#define BLOCK_NUM 1000
bool clean[BLOCK_NUM] ; // clean bit for physical block; phy block ID -> bool
/*#
requires \exists integer j; 0 <= j < BLOCK_NUM/2 ==> clean[j] == true;
*/
void test(){
int i = 0;
/*#
loop assigns i;
loop invariant 0 <= i < BLOCK_NUM;
*/
while( i < BLOCK_NUM && clean[i] == false ){
i += 1;
}
}
I also tried a different version adding more information to the invariant
void test(){
int i = 0;
/*#
loop assigns i;
loop invariant 0 <= i < BLOCK_NUM &&
\exists integer j; i <= j < BLOCK_NUM/2 ==> clean[j] == true;
*/
while( i < BLOCK_NUM && clean[i] == false ){
i += 1;
}
//# assert 0 <= i < BLOCK_NUM;
}
This translates to the following proof condition.
Goal Invariant (preserved):
Assume {
Type: is_sint32(i#L4) /\ is_sint32(1 + i#L4).
[...]
Stmt { L4: }
(* Invariant *)
Have: (0 <= i#L4) /\ (i#L4 <= 999) /\
(((i#L4 <= i_3) -> ((i_3 <= 499) -> (clean#L1[i_3] = 1)))).
(* Then *)
Have: clean#L1[i#L4] = 0.
}
Prove: ((-1) <= i#L4) /\ (i#L4 <= 998) /\
(exists i_4 : Z. ((i#L4 < i_4) -> ((i_4 <= 499) -> (clean#L1[i_4] = 1)))).
--------------------------------------------------------------------------------
Prover Alt-Ergo 2.4.1: Timeout (Qed:101ms) (10s) (cached).
But still all solvers (including Z3 and CVC4) fail to show it.
There are two issues in your specification. First, your precondition is incorrect. What you want to say is that there exists a j such that j is between appropriate bounds and clean[j] == true, i.e.
requires \exists integer j; 0 <= j < BLOCK_NUM/2 && clean[j] == true;
More generally, and this can indeed be quite confusing at first, while a universal quantification generally goes along the lines of \forall x; P(x) ==> Q(x) (For any x such that P(x) holds, then Q(x) holds as well), existential quantification is usually something like \exists x, P(x) && Q(x): if you use implication instead of conjunction in that case, then any x that does not satisfy P will be a witness for the existential formula.
The second point is that your loop invariant is too weak: you don't say anything about the values you've examined so far: with just the bounds on i, it is impossible to deduce that we will eventually check the value of the cell containing true. By adding as an invariant that we have examined all the cells before i (and found false, since otherwise we wouldn't be in the loop anymore), all the proofs can be completed automatically:
loop invariant all_false: \forall integer j; 0 <= j < i ==> clean[j] == false;
Note that I've also added a name all_false to the new loop invariant. As your number of clauses grows, it is useful to give them explicit names, that will be used in Frama-C's output, so that you can quickly spot which proof obligation failed.
For what it's worth, here is the complete file (I removed the unnecessary includes)
#include <stdbool.h>
#define BLOCK_NUM 1000
bool clean[BLOCK_NUM] ; // clean bit for physical block; phy block ID -> bool
/*#
requires \exists integer j; 0 <= j < BLOCK_NUM/2 && clean[j] == true;
*/
void test(){
int i = 0;
/*#
loop assigns i;
loop invariant all_false: \forall integer j; 0 <= j < i ==> clean[j] == false;
loop invariant 0 <= i < BLOCK_NUM;
*/
while( i < BLOCK_NUM && clean[i] == false ){
i += 1;
}
}

A potential bug in the induction strategy of Frama-C 24.0

I am working on the following proof and the invariant result_val is proved with an induction strategy on i using begin as the base case.
The sup case is trying to prove true which holds trivially using Frama-C 24.0. But when I switch to 25.0, it tries to prove a seemingly more complicated condition, which looks closer to a correct inductive inference because it did the weakest precondition computation explicitly.
However, all SMT solvers I tried cannot prove the condition generated by Frama-C 25.0.
I am a bit worried about the correctness of version 24.0's result because using true as the inductive proof goal seems to be unlikely. Can anyone hint to me at what happened? Is that a bug in 24.0 or just some difference in the implementation?
#include <stdbool.h>
#define SIZE 1000
bool data[SIZE] ;
/*#
logic integer count(integer begin, integer end)=
begin >= end ? 0 : (data[begin]==true) ? count(begin+1, end)+1 : count(begin+1, end);
*/
/*#
requires SIZE > begin >= 0;
requires SIZE >= end >= 0;
requires begin <= end;
assigns \nothing;
ensures \result == count(begin, end);
*/
unsigned int occurrences_of(int begin, int end)
{
unsigned int result = 0;
/*#
loop invariant i_bound: begin <= i <= end;
loop invariant result_bound: 0 <= result <= i-begin;
loop invariant result_val: result == count(begin, i);
loop assigns i, result;
loop variant end-i;
*/
for (unsigned int i = begin; i < end; ++i){
result += (data[i] == true) ? 1 : 0;
}
return result;
}
Below is the result from Frama-c 24.0
Proof:
Goal Invariant 'result_val' (preserved) (Induction: proved)
+ Goal Induction (Base) (proved)
+ Goal Induction (Induction (sup)) (proved)
+ Goal Induction (Induction (inf)) (proved)
Qed.
--------------------------------------------------------------------------------
Goal Induction (Induction (sup)):
Prove: true.
Below is the result from Frama-c 25.0
--------------------------------------------------------------------------------
Proof:
Goal Invariant 'result_val' (preserved) (Induction: pending)
+ Goal Induction (Base) (proved)
+ Goal Induction (Induction (sup)) (pending)
+ Goal Induction (Induction (inf)) (proved)
End.
--------------------------------------------------------------------------------
Goal Induction (Induction (sup)):
Let x_0 = to_uint32(end#L1).
Let x_1 = to_uint32(tmp#L12).
Let x_2 = data#L1[i#L6].
Let x_3 = result#L6.
Let x_4 = result#L13.
Let x_5 = to_uint32(1 + i#L6).
Assume {
Have: begin#L1 < i#L6.
Have: i#L6 <= end#L1.
Have: i#L6 < x_0.
Have: 0 <= x_3.
Have: x_5 <= end#L1.
Have: begin#L1 <= x_5.
Have: (begin#L1 + x_3) <= i#L6.
Have: (begin#L1 + x_4) <= x_5.
Have: is_uint32(i#L6).
Have: is_bool(x_2).
Have: is_uint32(x_3).
Have: if (x_2 = 1) then (tmp#L12 = 1) else (tmp#L12 = 0).
Have: forall i_0 : Z. let x_6 = L_count(data#L1, begin#L1, i_0) in
let x_7 = to_uint32(1 + i_0) in let x_8 = to_uint32(x_1 + x_6) in
let x_9 = data#L1[i_0] in ((i_0 <= end#L1) -> ((begin#L1 <= i_0) ->
((i_0 < i#L6) -> ((i_0 < x_0) -> ((0 <= x_6) -> ((x_7 <= end#L1) ->
((begin#L1 <= x_7) -> (((begin#L1 + x_6) <= i_0) ->
(((begin#L1 + x_8) <= x_7) -> (is_uint32(i_0) -> (is_bool(x_9) ->
(is_uint32(x_6) ->
((if (x_9 = 1) then (tmp#L12 = 1) else (tmp#L12 = 0)) ->
(L_count(data#L1, begin#L1, x_7) = x_8)))))))))))))).
[...]
Stmt { L6: }
Stmt { tmp = tmp_0; }
Stmt { L12: result = x_4; }
Stmt { L13: }
}
Prove: L_count(data#L1, begin#L1, x_5) = x_4.
Goal id: typed_occurrences_of_loop_invariant_result_val_preserved
Short id: occurrences_of_loop_invariant_result_val_preserved
--------------------------------------------------------------------------------
Prover Alt-Ergo 2.4.2: Timeout (Qed:52ms) (10s).
A bug on the typing of the induction tactic was indeed fixed between Frama-C 24 and 25 (https://git.frama-c.com/pub/frama-c/-/commit/6058453cce2715f7dcf9027767559f95fb3b1679). And the symptom was indeed that the tactic could generate ill-typed formulas with true instead of a term.
Proving this example in not that easy. For two main reasons:
the function and the definition work in the opposite directions,
the definition does not have an optimal expression for reasoning.
However, one can write a lemma function to solve the problem:
#include <stdbool.h>
#define SIZE 1000
bool data[SIZE] ;
/*#
logic integer count(integer begin, integer end)=
begin >= end ? 0 : ((data[begin]==true) ? count(begin+1, end)+1 : count(begin+1, end));
*/
/*# ghost
/# requires begin < end ;
assigns \nothing ;
ensures count(begin, end) == ((data[end-1]==true) ? count(begin, end-1)+1 : count(begin, end-1));
#/
void lemma(bool* d, int begin, int end){
/# loop invariant begin <= i < end ;
loop invariant count(i, end) == ((data[end-1]==true) ? count(i, end-1)+1 : count(i, end-1));
loop assigns i ;
loop variant i - begin ;
#/
for(int i = end-1 ; i > begin ; i--);
}
*/
/*#
requires SIZE > begin >= 0;
requires SIZE >= end >= 0;
requires begin <= end;
assigns \nothing;
ensures \result == count(begin, end);
*/
unsigned int occurrences_of(int begin, int end)
{
unsigned int result = 0;
/*#
loop invariant i_bound: begin <= i <= end;
loop invariant result_bound: 0 <= result <= i-begin;
loop invariant result_val: result == count(begin, i);
loop assigns i, result;
loop variant end-i;
*/
for (unsigned int i = begin; i < end; ++i){
result += (data[i] == true) ? 1 : 0;
//# ghost lemma(data, begin, i+1);
}
return result;
}
I'd suggest to use the following definition:
/*#
logic integer count(integer begin, integer end)=
begin >= end ? 0 : ((data[end-1]==true) ? 1 : 0) + count(begin, end-1);
*/
It works in the same direction as the function and avoids the duplication of the term count(begin, end-1) which makes reasoning easier.

prove decreases clause of mutually recursive class functions

I'm having trouble showing how to ensure recursively decreasing functions on a tree class in Dafny. I have the following definitions which verify.
class RoseTree {
var NodeType: int
var id: string
var children: array<RoseTree>
ghost var nodeSet: set<RoseTree>
constructor(nt: int, id: string, children: array<RoseTree>)
ensures forall x :: 0 <= x < children.Length ==> children[x].nodeSet <= this.nodeSet
ensures forall x :: 0 <= x < this.children.Length ==> this.children[x].nodeSet <= this.nodeSet
{
this.NodeType := nt;
this.id := id;
this.children := children;
if children.Length == 0 {
this.nodeSet := {this};
}else{
this.nodeSet := {this}+childrenNodeSet(children);
}
}
}
function setRosePick(s: set<set<RoseTree>>): set<RoseTree>
requires s != {}
{
var x :| x in s; x
}
function setUnion(setosets: set<set<RoseTree>>) : set<RoseTree>
decreases setosets
{
if setosets == {} then {} else
var x := setRosePick(setosets);
assert x <= x + setUnion(setosets-{x});
x + setUnion(setosets-{x})
}
lemma setUnionDef(s: set<set<RoseTree>>, y: set<RoseTree>)
requires y in s
ensures setUnion(s) == y + setUnion(s - {y})
{
var x := setRosePick(s);
if y == x {
}else{
calc {
setUnion(s);
==
x + setUnion(s - {x});
== {setUnionDef(s - {x}, y); }
x + y + setUnion(s - {x} - {y});
== { assert s - {x} - {y} == s - {y} - {x}; }
y + x + setUnion(s - {y} - {x});
== {setUnionDef(s - {y}, x); }
y + setUnion(s - {y});
}
}
}
lemma setUnionReturns(s: set<set<RoseTree>>)
ensures s == {} ==> setUnion(s) == {}
ensures s != {} ==> forall x :: x in s ==> x <= setUnion(s)
{
if s == {} {
assert setUnion(s) == {};
} else {
forall x | x in s
ensures x <= setUnion(s)
{
setUnionDef(s, x);
assert x <= x + setUnion(s-{x});
}
}
}
function childNodeSets(children: array<RoseTree>): set<set<RoseTree>>
reads children
reads set x | 0 <= x < children.Length :: children[x]
{
set x | 0 <= x < children.Length :: children[x].nodeSet
}
function childNodeSetsPartial(children: array<RoseTree>, index: int): set<set<RoseTree>>
requires 0 <= index < children.Length
reads children
reads set x | index <= x < children.Length :: children[x]
{
set x | index <= x < children.Length :: children[x].nodeSet
}
function childrenNodeSet(children: array<RoseTree>): set<RoseTree>
reads children
reads set x | 0 <= x < children.Length :: children[x]
ensures forall x :: x in childNodeSets(children) ==> x <= childrenNodeSet(children)
ensures forall i :: 0 <= i < children.Length ==> children[i].nodeSet <= childrenNodeSet(children)
{
var y := childNodeSets(children);
setUnionReturns(y);
setUnion(y)
}
In particular I'm trying to define the height function for the tree.
function height(node: RoseTree):nat
reads node
reads node.children
reads set x | 0 <= x < node.children.Length :: node.children[x]
decreases node.nodeSet
{
if node.children.Length == 0 then 1 else 1 + maxChildHeight(node, node.children,node.children.Length-1,0)
}
function maxChildHeight(node: RoseTree, children: array<RoseTree>, index: nat, best: nat) : nat
reads node
reads node.children
reads set x | 0 <= x < node.children.Length :: node.children[x]
requires children == node.children
requires 0 <= index < children.Length
ensures forall x :: 0 <= x <= index < children.Length ==> maxChildHeight(node, children, index, best) >= height(children[x])
decreases node.nodeSet - setUnion(childNodeSetsPartial(children, index)), 1
{
if index == 0 then best else if height(children[index]) >= best then maxChildHeight(node, children, index-1, height(children[index])) else maxChildHeight(node, children, index-1, best)
}
I though it should be possible to show that the nodeSet of the node will be a subset of its parent node or that the union of child node sets will be a subset of the parent node, and thus both functions will terminate. My decreases expressions don't prove it to dafny and I'm not quite sure how to proceed. Is there another way to prove termination or can I fix these decrease statements?
Also, do all instances of a class have the constructor ensure statements applied implicitly or only if explicitly constructed using the constructor?
Edit: updated definitions of childNodeSetsPartial and maxChildHeight
to recurse downward. It still doesn't verify.
Defining mutable linked heap-allocated data structures in Dafny is not very common except as an exercise. So you should consider whether a datatype would serve you better, as in
datatype RoseTree = Node(children: seq<RoseTree>)
function height(r: RoseTree): int
{
if r.children == [] then
1
else
var c := set i | 0 <= i < |r.children| :: height(r.children[i]);
assert height(r.children[0]) in c;
assert c != {};
SetMax(c) + 1
}
If you insist on mutable linked heap-allocated data structures, then there is a standard idiom for doing that. Please read sections 0 and 1 of these lecture notes and check out the modern version of the example code here.
Applying this idiom to your code, we get the following.
class RoseTree {
var NodeType: int
var id: string
var children: array<RoseTree>
ghost var repr: set<object>
predicate Valid()
reads this, repr
decreases repr
{
&& this in repr
&& children in repr
&& (forall i | 0 <= i < children.Length ::
children[i] in repr
&& children[i].repr <= repr
&& this !in children[i].repr
&& children[i].Valid())
}
constructor(nt: int, id: string, children: array<RoseTree>)
requires forall i | 0 <= i < children.Length :: children[i].Valid()
ensures Valid()
{
this.NodeType := nt;
this.id := id;
this.children := children;
this.repr := {this, children} +
(set i | 0 <= i < children.Length :: children[i]) +
(set x, i | 0 <= i < children.Length && x in children[i].repr :: x);
}
}
function SetMax(s: set<int>): int
requires s != {}
ensures forall x | x in s :: SetMax(s) >= x
{
var x :| x in s;
if s == {x} then
x
else
var y := SetMax(s - {x});
assert forall z | z in s :: z == x || (z in (s - {x}) && y >= z);
if x > y then x else y
}
function height(node: RoseTree): nat
requires node.Valid()
reads node.repr
{
if node.children.Length == 0 then
1
else
var c := set i | 0 <= i < node.children.Length :: height(node.children[i]);
assert height(node.children[0]) in c;
assert c != {};
SetMax(c) + 1
}
do all instances of a class have the constructor ensure statements applied implicitly or only if explicitly constructed using the constructor?
I'm not sure if I understand this question. I think the answer is "no", though. Since a class might have multiple constructors with different postconditions.

Assertion on pointer to array

I have defined the following function which is well proved by frama-c:
//ensures array <= \result < array+length && *\result == element;
/*#
requires 0 < length;
requires \valid_read(array + (0 .. length-1));
assigns \nothing;
behavior in:
assumes \exists int off ; 0 <= off < length && array[off] == element;
ensures *\result == element;
behavior notin:
assumes \forall int off ; 0 <= off < length ==> array[off] != element;
ensures \result == 0;
disjoint behaviors;
complete behaviors;
*/
int* search(int* array, int length, int element){
int *tmp;
/*#
loop invariant 0 <= i <= length;
loop invariant \forall int j; 0 <= j < i ==> array[j] != element;
loop assigns i;
loop variant length-i;
*/
for(int i = 0; i < length; i++)
{
if(array[i] == element)
{
tmp = &array[i];
//# assert *tmp==element;
}
else
{
tmp = 0;
}
}
return tmp;
}
and I use it in the following main entry:
int main(){
int arr[5]={1,2,3,4,5};
int *p_arr;
p_arr = search(arr,5,4);
//# assert *p_arr==30;
return 0
}
I am wondering why frama-c give the assertion "//# assert *p_arr==30;" as true, I do not understand.
Thanks
Using the command line only, I saw some problems in your code:
tmp is missing in the loop assigns;
you need to:
either add a break in the then branch of the seach function
(then you would return the pointer on the first element that match)
or initialize tmp = 0 at the beginning of the function and remove the else branch in the loop (then you would return a pointer on the last occurrence).
I didn't try the GUI, but it seems strange that you say that your example is:
well proved by frama-c
I suggest that you use the command line to begin with.
Ok now I correct my code as follow:
//ensures array <= \result < array+length && *\result == element;
/*#
requires 0 < length;
requires \valid_read(array + (0 .. length-1));
assigns \nothing;
behavior in:
assumes \exists int off ; 0 <= off < length && array[off] == element;
ensures *\result == element;
behavior notin:
assumes \forall int off ; 0 <= off < length ==> array[off] != element;
ensures \result == 0;
disjoint behaviors;
complete behaviors;
*/
int* search(int* array, int length, int element){
/*#
loop invariant 0 <= i <= length;
loop invariant \forall int j; 0 <= j < i ==> array[j] != element;
loop assigns i;
loop variant length-i;
*/
for(int i = 0; i < length ; i++)
{
if(array[i] == element)
{
return &array[i];
}
}
return 0;
}
and add the following assertion:
int main()
{
int arr[5] = {1,2,3,4,5};
int *ptr;
ptr = search(arr,5,3);
//# assert *ptr==3;
}
then run: frama-c -wp -rte myfile.c and got the result:
[wp] Proved goals: 65 / 65
Qed: 35 (1.00ms-6ms-24ms)
Alt-Ergo: 30 (16ms-30ms-94ms) (132)
If I set another assertion :
int main()
{
int arr[5] = {1,2,3,4,5};
int *ptr;
ptr = search(arr,5,3);
//# assert *ptr==5;
}
Then I get the output:
[wp] [Alt-Ergo] Goal typed_main_assert_2 : Timeout (Qed:4ms) (10s)
[wp] Proved goals: 64 / 65
Qed: 35 (1.00ms-4ms-10ms)
Alt-Ergo: 29 (16ms-28ms-109ms) (132) (interrupted: 1)
So the assertion is "unknown" as we expected and if we run frama-c-gui the bullet is orange.
So that's working fine , take care about wrong axiomatic stuff !
Thank you Anne for your help.

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