Pierre Letouzey edited this page Oct 27, 2017 · 11 revisions

We want to formalise the following Haskell implementation of quicksort algorithm in Coq:

quicksort :: (Ord a) => [a] -> [a]
quicksort []           = []
quicksort (pivot:rest) = quicksort [y | y <- rest, y < pivot] ++
                                        [pivot] ++
                                        quicksort [y | y <- rest, pivot <= y]

We will use the method known as the recursion on an ad hoc predicate. This is a method for defining general recursive functions based on InductiveDomainPredicate paradigm. We define the algorithm on integers, the generalisation to a generic ordered type being trivial.

First we need to formalise the main component of quicksort which is the list comprehension function. It is possible to formalise the general case of MonadicListComprehension but here we only define the instance that we need:

Definition is_decidable (A:Set) (P:A->Prop) := forall a, {P a} + {~(P a)}.
Fixpoint list_comprehension (A : Set) (l : list A) {struct l} : forall P : A -> Prop, is_decidable A P -> list A :=
  match l with
  | nil => fun (P : A -> Prop) (_ : is_decidable A P) => nil
  | x :: xs =>
      fun (P : A -> Prop) (H_dec : is_decidable A P) =>
      match H_dec x with
      | left _ => x :: list_comprehension A xs P H_dec
      | right _ => list_comprehension A xs P H_dec

It is easy to define the familiar notation for list comprehension (see TipsAndTricks):

Notation "[ e | b <- l , Hp ]" := (map (fun b:Z=> e) ((list_comprehension Z) l (fun b:Z=>_ ) Hp))  (at level 1).

Now we define the domain of the quicksort function as an inductive prediacte that lives in Prop:

Inductive is_sortable : list Z -> Prop :=
  | is_sortable_nil : forall l, l = nil -> is_sortable l
  | is_sortable_concat : forall (l:list Z) (pivot:Z) (rest:list Z), l = pivot::rest ->
                                                       is_sortable [ y | y <- rest , (Zlt_is_decidable pivot)] ->
                                                       is_sortable [ y | y <- rest , (Zle_is_decidable pivot)] ->
                                                       is_sortable (pivot::rest).

As it can be seen the predicate has two constructors, each corresponding to a branch of the Haskell definition.

Next we need to prove the inverse of the second constructor without using inversion. This constructor has two inverses, we prove both. Here is a possible proof:

Lemma is_sortable_concat_inv_1 : forall l pivot rest, is_sortable l -> l = pivot::rest -> is_sortable [ y | y <- rest , (Zlt_is_decidable pivot) ].
 simple destruct 1; [ intros l0 H0 H1 | intros l0 pivot0 rest0 H0 H1 H2 H3];
  apply False_ind;
  rewrite H0 in H1;
  replace pivot with pivot0;
  [ replace rest with rest0; trivial;
    change (tail (pivot0 :: rest0)=tail (pivot :: rest))
  | apply Some_inv;
    change (head (pivot0 :: rest0)=head (pivot :: rest))
  rewrite <- H3; trivial

The proof of second inversion lemma is identical to the first one:

Lemma is_sortable_concat_inv_2 : forall l pivot rest, is_sortable l -> l = pivot::rest -> is_sortable [ y | y <- rest , (Zle_is_decidable pivot) ].

Finally we can give the definition of quicksort_aux function.

Fixpoint quicksort_aux (l : list Z) (H_sortable : is_sortable l) {struct H_sortable} : list Z :=
         match l as l0 return (l = l0 -> list Z) with
         | nil => fun _ : l = nil => nil
         | pivot :: rest =>
             fun H : l = pivot :: rest =>
             quicksort_aux [y | y <- rest, Zlt_is_decidable pivot] (is_sortable_concat_inv_1 l pivot rest H_sortable H) ++
             (pivot :: nil) ++
             quicksort_aux [y | y <- rest, Zle_is_decidable pivot] (is_sortable_concat_inv_2 l pivot rest H_sortable H)
         end (refl_equal l).

The quicksort_aux function when extracted to Haskell is identical (modulo extraction of the constants) to the Haskell code that we started with.

However, inside Coq it is a function with 2 arguments despite the fact that we know that quicksort is a total function (and hence should have one argument). So we need to prove that quicksort_aux is total. I.e we should prove that

Theorem everylist_is_sortable : forall (l:list Z), is_sortable l.

We prove this by induction on the length of l. For this we need the following lemma

Lemma induction_ltof1_Prop
     : forall (A : Set) (f : A -> nat) (P : A -> Prop),
       (forall x : A, (forall y : A, Wf_nat.ltof A f y x -> P y) -> P x) ->
       forall a : A, P a.

which is missing in the StandardLibrary (the similar case where P: A -> Set exists as Coq.Arith.Wf_nat.induction_ltof1).

Furthermore we need the following fact about list comprehension, that says that any sublist obtained by list comprehension on tail of a list is necessarily shorter than the original list.

Lemma tail_comprehension_shortens:forall A pivot rest P H, length (list_comprehension A rest P H) < length (pivot::rest).
intros A pivot rest P H.
 induction rest. 
 simpl; constructor.
 unfold list_comprehension_Z; simpl.
 case (H a);
 intros H_a_pivot;
 [  apply lt_n_S;
   replace (S (length rest)) with  (length (pivot :: rest))
 | constructor
 ]; trivial.

We need two instances of this lemma, namely

Lemma length_elt_lt:forall pivot rest, length [ y | y <- rest , (Zlt_is_decidable pivot)] < length (pivot::rest).
Lemma length_elt_le:forall pivot rest, length [ y | y <- rest , (Zle_is_decidable pivot)] < length (pivot::rest).

Having proved the above we can prove the totality:

Theorem everylist_is_sortable : forall l, is_sortable l.
 intros l;
 apply (induction_ltof1_Prop _ (@length Z));
 clear l; intros [|x xs] H_ind;
 [ constructor 1; trivial
 | apply (is_sortable_concat _ _ _ (refl_equal (x::xs)));
   apply H_ind; red
 [ apply length_elt_lt
 | apply length_elt_le

Whence we can define the total function quicksort simply as

Definition quicksort l := quicksort_aux l (everylist_is_sortable l).

At this point, we already can evaluate wth our quicksort inside Coq

Time Eval compute in (quicksort (quicksort (99 :: 11 :: 4 :: -9 :: -23 :: -88 :: nil))).

= -88 :: -23 :: -9 :: 4 :: 11 :: 99 :: nil
: list Z

Finished transaction in 1. secs (0.37u,0.s)

To prove any further properties we need some basic facts. The most essential ones are the FixpointEquations of quicksort and quicksort_aux. For the latter we first need to prove the ProofIrrelevance. I.e. we should prove that

Lemma quicksort_aux_proof_irrelevance : forall l (H_sort1 H_sort2: is_sortable l), quicksort_aux l H_sort1 = quicksort_aux l H_sort2.

There are various ways to prove this. One way is to apply double induction on the strong elimination predicate which is generated by the following invocation of [Scheme] VernacularCommand.

Scheme is_sortable_ind_dep := Induction for is_sortable Sort Prop.

This will generate an strong (dependent) elimination principle which enables us to prove quicksort_aux_proof_irrelevance.

Applying quicksort_aux_proof_irrelevance one can easily prove the FixpointEquations of quicksort_aux

Lemma quicksort_aux_nil :forall l H_sort, l=nil -> quicksort_aux l H_sort = nil.
Lemma quicksort_aux_cons :forall l pivot rest H_sort, l=pivot::rest -> forall H_sort_lt H_sort_le, quicksort_aux l H_sort =
          quicksort_aux [y | y <- rest, Zlt_is_decidable pivot] H_sort_lt ++ (pivot :: nil) ++
          quicksort_aux [y | y <- rest, Zle_is_decidable pivot] H_sort_le.

which in turn gives us the FixpointEquations of quicksort:

Lemma quicksort_nil :forall l, l=nil -> quicksort l = nil.
Lemma quicksort_cons :forall l pivot rest, l=pivot::rest ->
       quicksort l = quicksort [y | y <- rest, Zlt_is_decidable pivot] ++ (pivot :: nil) ++
                             quicksort [y | y <- rest, Zle_is_decidable pivot].

-- -- MiladNiqui

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