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(* (c) Copyright 2006-2016 Microsoft Corporation and Inria. *)
(* Distributed under the terms of CeCILL-B. *)
From mathcomp Require Import ssreflect ssrfun ssrbool eqtype ssrnat seq.
(******************************************************************************)
(* The basic theory of paths over an eqType; this file is essentially a *)
(* complement to seq.v. Paths are non-empty sequences that obey a progression *)
(* relation. They are passed around in three parts: the head and tail of the *)
(* sequence, and a proof of (boolean) predicate asserting the progression. *)
(* This "exploded" view is rarely embarrassing, as the first two parameters *)
(* are usually inferred from the type of the third; on the contrary, it saves *)
(* the hassle of constantly constructing and destructing a dependent record. *)
(* We define similarly cycles, for which we allow the empty sequence, *)
(* which represents a non-rooted empty cycle; by contrast, the "empty" path *)
(* from a point x is the one-item sequence containing only x. *)
(* We allow duplicates; uniqueness, if desired (as is the case for several *)
(* geometric constructions), must be asserted separately. We do provide *)
(* shorthand, but only for cycles, because the equational properties of *)
(* "path" and "uniq" are unfortunately incompatible (esp. wrt "cat"). *)
(* We define notations for the common cases of function paths, where the *)
(* progress relation is actually a function. In detail: *)
(* path e x p == x :: p is an e-path [:: x_0; x_1; ... ; x_n], i.e., we *)
(* e x_i x_{i+1} for all i < n. The path x :: p starts at x *)
(* and ends at last x p. *)
(* fpath f x p == x :: p is an f-path, where f is a function, i.e., p is of *)
(* the form [:: f x; f (f x); ...]. This is just a notation *)
(* for path (frel f) x p. *)
(* sorted e s == s is an e-sorted sequence: either s = [::], or s = x :: p *)
(* is an e-path (this is oten used with e = leq or ltn). *)
(* cycle e c == c is an e-cycle: either c = [::], or c = x :: p with *)
(* x :: (rcons p x) an e-path. *)
(* fcycle f c == c is an f-cycle, for a function f. *)
(* traject f x n == the f-path of size n starting at x *)
(* := [:: x; f x; ...; iter n.-1 f x] *)
(* looping f x n == the f-paths of size greater than n starting at x loop *)
(* back, or, equivalently, traject f x n contains all *)
(* iterates of f at x. *)
(* merge e s1 s2 == the e-sorted merge of sequences s1 and s2: this is always *)
(* a permutation of s1 ++ s2, and is e-sorted when s1 and s2 *)
(* are and e is total. *)
(* sort e s == a permutation of the sequence s, that is e-sorted when e *)
(* is total (computed by a merge sort with the merge function *)
(* above). *)
(* mem2 s x y == x, then y occur in the sequence (path) s; this is *)
(* non-strict: mem2 s x x = (x \in s). *)
(* next c x == the successor of the first occurrence of x in the sequence *)
(* c (viewed as a cycle), or x if x \notin c. *)
(* prev c x == the predecessor of the first occurrence of x in the *)
(* sequence c (viewed as a cycle), or x if x \notin c. *)
(* arc c x y == the sub-arc of the sequece c (viewed as a cycle) starting *)
(* at the first occurrence of x in c, and ending just before *)
(* the next ocurrence of y (in cycle order); arc c x y *)
(* returns an unspecified sub-arc of c if x and y do not both *)
(* occur in c. *)
(* ucycle e c <-> ucycleb e c (ucycle e c is a Coercion target of type Prop) *)
(* ufcycle f c <-> c is a simple f-cycle, for a function f. *)
(* shorten x p == the tail a duplicate-free subpath of x :: p with the same *)
(* endpoints (x and last x p), obtained by removing all loops *)
(* from x :: p. *)
(* rel_base e e' h b <-> the function h is a functor from relation e to *)
(* relation e', EXCEPT at points whose image under h satisfy *)
(* the "base" predicate b: *)
(* e' (h x) (h y) = e x y UNLESS b (h x) holds *)
(* This is the statement of the side condition of the path *)
(* functorial mapping lemma map_path. *)
(* fun_base f f' h b <-> the function h is a functor from function f to f', *)
(* except at the preimage of predicate b under h. *)
(* We also provide three segmenting dependently-typed lemmas (splitP, splitPl *)
(* and splitPr) whose elimination split a path x0 :: p at an internal point x *)
(* as follows: *)
(* - splitP applies when x \in p; it replaces p with (rcons p1 x ++ p2), so *)
(* that x appears explicitly at the end of the left part. The elimination *)
(* of splitP will also simultaneously replace take (index x p) with p1 and *)
(* drop (index x p).+1 p with p2. *)
(* - splitPl applies when x \in x0 :: p; it replaces p with p1 ++ p2 and *)
(* simulaneously generates an equation x = last x0 p. *)
(* - splitPr applies when x \in p; it replaces p with (p1 ++ x :: p2), so x *)
(* appears explicitly at the start of the right part. *)
(* The parts p1 and p2 are computed using index/take/drop in all cases, but *)
(* only splitP attemps to subsitute the explicit values. The substitution of *)
(* p can be deferred using the dependent equation generation feature of *)
(* ssreflect, e.g.: case/splitPr def_p: {1}p / x_in_p => [p1 p2] generates *)
(* the equation p = p1 ++ p2 instead of performing the substitution outright. *)
(* Similarly, eliminating the loop removal lemma shortenP simultaneously *)
(* replaces shorten e x p with a fresh constant p', and last x p with *)
(* last x p'. *)
(* Note that although all "path" functions actually operate on the *)
(* underlying sequence, we provide a series of lemmas that define their *)
(* interaction with thepath and cycle predicates, e.g., the cat_path equation *)
(* can be used to split the path predicate after splitting the underlying *)
(* sequence. *)
(******************************************************************************)
Set Implicit Arguments.
Unset Strict Implicit.
Unset Printing Implicit Defensive.
Section Paths.
Variables (n0 : nat) (T : Type).
Section Path.
Variables (x0_cycle : T) (e : rel T).
Fixpoint path x (p : seq T) :=
if p is y :: p' then e x y && path y p' else true.
Lemma cat_path x p1 p2 : path x (p1 ++ p2) = path x p1 && path (last x p1) p2.
Proof. by elim: p1 x => [|y p1 Hrec] x //=; rewrite Hrec -!andbA. Qed.
Lemma rcons_path x p y : path x (rcons p y) = path x p && e (last x p) y.
Proof. by rewrite -cats1 cat_path /= andbT. Qed.
Lemma pathP x p x0 :
reflect (forall i, i < size p -> e (nth x0 (x :: p) i) (nth x0 p i))
(path x p).
Proof.
elim: p x => [|y p IHp] x /=; first by left.
apply: (iffP andP) => [[e_xy /IHp e_p [] //] | e_p].
by split; [apply: (e_p 0) | apply/(IHp y) => i; apply: e_p i.+1].
Qed.
Definition cycle p := if p is x :: p' then path x (rcons p' x) else true.
Lemma cycle_path p : cycle p = path (last x0_cycle p) p.
Proof. by case: p => //= x p; rewrite rcons_path andbC. Qed.
Lemma rot_cycle p : cycle (rot n0 p) = cycle p.
Proof.
case: n0 p => [|n] [|y0 p] //=; first by rewrite /rot /= cats0.
rewrite /rot /= -{3}(cat_take_drop n p) -cats1 -catA cat_path.
case: (drop n p) => [|z0 q]; rewrite /= -cats1 !cat_path /= !andbT andbC //.
by rewrite last_cat; repeat bool_congr.
Qed.
Lemma rotr_cycle p : cycle (rotr n0 p) = cycle p.
Proof. by rewrite -rot_cycle rotrK. Qed.
End Path.
Lemma eq_path e e' : e =2 e' -> path e =2 path e'.
Proof. by move=> ee' x p; elim: p x => //= y p IHp x; rewrite ee' IHp. Qed.
Lemma eq_cycle e e' : e =2 e' -> cycle e =1 cycle e'.
Proof. by move=> ee' [|x p] //=; apply: eq_path. Qed.
Lemma sub_path e e' : subrel e e' -> forall x p, path e x p -> path e' x p.
Proof. by move=> ee' x p; elim: p x => //= y p IHp x /andP[/ee'-> /IHp]. Qed.
Lemma rev_path e x p :
path e (last x p) (rev (belast x p)) = path (fun z => e^~ z) x p.
Proof.
elim: p x => //= y p IHp x; rewrite rev_cons rcons_path -{}IHp andbC.
by rewrite -(last_cons x) -rev_rcons -lastI rev_cons last_rcons.
Qed.
End Paths.
Arguments pathP {T e x p}.
Section EqPath.
Variables (n0 : nat) (T : eqType) (x0_cycle : T) (e : rel T).
Implicit Type p : seq T.
Variant split x : seq T -> seq T -> seq T -> Type :=
Split p1 p2 : split x (rcons p1 x ++ p2) p1 p2.
Lemma splitP p x (i := index x p) :
x \in p -> split x p (take i p) (drop i.+1 p).
Proof.
move=> p_x; have lt_ip: i < size p by rewrite index_mem.
by rewrite -{1}(cat_take_drop i p) (drop_nth x lt_ip) -cat_rcons nth_index.
Qed.
Variant splitl x1 x : seq T -> Type :=
Splitl p1 p2 of last x1 p1 = x : splitl x1 x (p1 ++ p2).
Lemma splitPl x1 p x : x \in x1 :: p -> splitl x1 x p.
Proof.
rewrite inE; case: eqP => [->| _ /splitP[]]; first by rewrite -(cat0s p).
by split; apply: last_rcons.
Qed.
Variant splitr x : seq T -> Type :=
Splitr p1 p2 : splitr x (p1 ++ x :: p2).
Lemma splitPr p x : x \in p -> splitr x p.
Proof. by case/splitP=> p1 p2; rewrite cat_rcons. Qed.
Fixpoint next_at x y0 y p :=
match p with
| [::] => if x == y then y0 else x
| y' :: p' => if x == y then y' else next_at x y0 y' p'
end.
Definition next p x := if p is y :: p' then next_at x y y p' else x.
Fixpoint prev_at x y0 y p :=
match p with
| [::] => if x == y0 then y else x
| y' :: p' => if x == y' then y else prev_at x y0 y' p'
end.
Definition prev p x := if p is y :: p' then prev_at x y y p' else x.
Lemma next_nth p x :
next p x = if x \in p then
if p is y :: p' then nth y p' (index x p) else x
else x.
Proof.
case: p => //= y0 p.
elim: p {2 3 5}y0 => [|y' p IHp] y /=; rewrite (eq_sym y) inE;
by case: ifP => // _; apply: IHp.
Qed.
Lemma prev_nth p x :
prev p x = if x \in p then
if p is y :: p' then nth y p (index x p') else x
else x.
Proof.
case: p => //= y0 p; rewrite inE orbC.
elim: p {2 5}y0 => [|y' p IHp] y; rewrite /= ?inE // (eq_sym y').
by case: ifP => // _; apply: IHp.
Qed.
Lemma mem_next p x : (next p x \in p) = (x \in p).
Proof.
rewrite next_nth; case p_x: (x \in p) => //.
case: p (index x p) p_x => [|y0 p'] //= i _; rewrite inE.
have [lt_ip | ge_ip] := ltnP i (size p'); first by rewrite orbC mem_nth.
by rewrite nth_default ?eqxx.
Qed.
Lemma mem_prev p x : (prev p x \in p) = (x \in p).
Proof.
rewrite prev_nth; case p_x: (x \in p) => //; case: p => [|y0 p] // in p_x *.
by apply mem_nth; rewrite /= ltnS index_size.
Qed.
(* ucycleb is the boolean predicate, but ucycle is defined as a Prop *)
(* so that it can be used as a coercion target. *)
Definition ucycleb p := cycle e p && uniq p.
Definition ucycle p : Prop := cycle e p && uniq p.
(* Projections, used for creating local lemmas. *)
Lemma ucycle_cycle p : ucycle p -> cycle e p.
Proof. by case/andP. Qed.
Lemma ucycle_uniq p : ucycle p -> uniq p.
Proof. by case/andP. Qed.
Lemma next_cycle p x : cycle e p -> x \in p -> e x (next p x).
Proof.
case: p => //= y0 p; elim: p {1 3 5}y0 => [|z p IHp] y /=; rewrite inE.
by rewrite andbT; case: (x =P y) => // ->.
by case/andP=> eyz /IHp; case: (x =P y) => // ->.
Qed.
Lemma prev_cycle p x : cycle e p -> x \in p -> e (prev p x) x.
Proof.
case: p => //= y0 p; rewrite inE orbC.
elim: p {1 5}y0 => [|z p IHp] y /=; rewrite ?inE.
by rewrite andbT; case: (x =P y0) => // ->.
by case/andP=> eyz /IHp; case: (x =P z) => // ->.
Qed.
Lemma rot_ucycle p : ucycle (rot n0 p) = ucycle p.
Proof. by rewrite /ucycle rot_uniq rot_cycle. Qed.
Lemma rotr_ucycle p : ucycle (rotr n0 p) = ucycle p.
Proof. by rewrite /ucycle rotr_uniq rotr_cycle. Qed.
(* The "appears no later" partial preorder defined by a path. *)
Definition mem2 p x y := y \in drop (index x p) p.
Lemma mem2l p x y : mem2 p x y -> x \in p.
Proof.
by rewrite /mem2 -!index_mem size_drop ltn_subRL; apply/leq_ltn_trans/leq_addr.
Qed.
Lemma mem2lf {p x y} : x \notin p -> mem2 p x y = false.
Proof. exact/contraNF/mem2l. Qed.
Lemma mem2r p x y : mem2 p x y -> y \in p.
Proof.
by rewrite -[in y \in p](cat_take_drop (index x p) p) mem_cat orbC /mem2 => ->.
Qed.
Lemma mem2rf {p x y} : y \notin p -> mem2 p x y = false.
Proof. exact/contraNF/mem2r. Qed.
Lemma mem2_cat p1 p2 x y :
mem2 (p1 ++ p2) x y = mem2 p1 x y || mem2 p2 x y || (x \in p1) && (y \in p2).
Proof.
rewrite [LHS]/mem2 index_cat fun_if if_arg !drop_cat addKn.
case: ifPn => [p1x | /mem2lf->]; last by rewrite ltnNge leq_addr orbF.
by rewrite index_mem p1x mem_cat -orbA (orb_idl (@mem2r _ _ _)).
Qed.
Lemma mem2_splice p1 p3 x y p2 :
mem2 (p1 ++ p3) x y -> mem2 (p1 ++ p2 ++ p3) x y.
Proof.
by rewrite !mem2_cat mem_cat andb_orr orbC => /or3P[]->; rewrite ?orbT.
Qed.
Lemma mem2_splice1 p1 p3 x y z :
mem2 (p1 ++ p3) x y -> mem2 (p1 ++ z :: p3) x y.
Proof. exact: mem2_splice [::z]. Qed.
Lemma mem2_cons x p y z :
mem2 (x :: p) y z = (if x == y then z \in x :: p else mem2 p y z).
Proof. by rewrite [LHS]/mem2 /=; case: ifP. Qed.
Lemma mem2_seq1 x y z : mem2 [:: x] y z = (y == x) && (z == x).
Proof. by rewrite mem2_cons eq_sym inE. Qed.
Lemma mem2_last y0 p x : mem2 p x (last y0 p) = (x \in p).
Proof.
apply/idP/idP; first exact: mem2l; rewrite -index_mem /mem2 => p_x.
by rewrite -nth_last -(subnKC p_x) -nth_drop mem_nth // size_drop subnSK.
Qed.
Lemma mem2l_cat {p1 p2 x} : x \notin p1 -> mem2 (p1 ++ p2) x =1 mem2 p2 x.
Proof. by move=> p1'x y; rewrite mem2_cat (negPf p1'x) mem2lf ?orbF. Qed.
Lemma mem2r_cat {p1 p2 x y} : y \notin p2 -> mem2 (p1 ++ p2) x y = mem2 p1 x y.
Proof.
by move=> p2'y; rewrite mem2_cat (negPf p2'y) -orbA orbC andbF mem2rf.
Qed.
Lemma mem2lr_splice {p1 p2 p3 x y} :
x \notin p2 -> y \notin p2 -> mem2 (p1 ++ p2 ++ p3) x y = mem2 (p1 ++ p3) x y.
Proof.
move=> p2'x p2'y; rewrite catA !mem2_cat !mem_cat.
by rewrite (negPf p2'x) (negPf p2'y) (mem2lf p2'x) andbF !orbF.
Qed.
Variant split2r x y : seq T -> Type :=
Split2r p1 p2 of y \in x :: p2 : split2r x y (p1 ++ x :: p2).
Lemma splitP2r p x y : mem2 p x y -> split2r x y p.
Proof.
move=> pxy; have px := mem2l pxy.
have:= pxy; rewrite /mem2 (drop_nth x) ?index_mem ?nth_index //.
by case/splitP: px => p1 p2; rewrite cat_rcons.
Qed.
Fixpoint shorten x p :=
if p is y :: p' then
if x \in p then shorten x p' else y :: shorten y p'
else [::].
Variant shorten_spec x p : T -> seq T -> Type :=
ShortenSpec p' of path e x p' & uniq (x :: p') & subpred (mem p') (mem p) :
shorten_spec x p (last x p') p'.
Lemma shortenP x p : path e x p -> shorten_spec x p (last x p) (shorten x p).
Proof.
move=> e_p; have: x \in x :: p by apply: mem_head.
elim: p x {1 3 5}x e_p => [|y2 p IHp] x y1.
by rewrite mem_seq1 => _ /eqP->.
rewrite inE orbC /= => /andP[ey12 /IHp {IHp}IHp].
case: ifPn => [y2p_x _ | not_y2p_x /eqP def_x].
have [p' e_p' Up' p'p] := IHp _ y2p_x.
by split=> // y /p'p; apply: predU1r.
have [p' e_p' Up' p'p] := IHp y2 (mem_head y2 p).
have{p'p} p'p z: z \in y2 :: p' -> z \in y2 :: p.
by rewrite !inE; case: (z == y2) => // /p'p.
rewrite -(last_cons y1) def_x; split=> //=; first by rewrite ey12.
by rewrite (contra (p'p y1)) -?def_x.
Qed.
End EqPath.
(* Ordered paths and sorting. *)
Section SortSeq.
Variable T : eqType.
Variable leT : rel T.
Definition sorted s := if s is x :: s' then path leT x s' else true.
Lemma path_sorted x s : path leT x s -> sorted s.
Proof. by case: s => //= y s /andP[]. Qed.
Lemma path_min_sorted x s :
{in s, forall y, leT x y} -> path leT x s = sorted s.
Proof. by case: s => //= y s -> //; apply: mem_head. Qed.
Section Transitive.
Hypothesis leT_tr : transitive leT.
Lemma subseq_order_path x s1 s2 :
subseq s1 s2 -> path leT x s2 -> path leT x s1.
Proof.
elim: s2 x s1 => [|y s2 IHs] x [|z s1] //= {IHs}/(IHs y).
case: eqP => [-> | _] IHs /andP[] => [-> // | leTxy /IHs /=].
by case/andP=> /(leT_tr leTxy)->.
Qed.
Lemma order_path_min x s : path leT x s -> all (leT x) s.
Proof.
move/subseq_order_path=> le_x_s; apply/allP=> y.
by rewrite -sub1seq => /le_x_s/andP[].
Qed.
Lemma subseq_sorted s1 s2 : subseq s1 s2 -> sorted s2 -> sorted s1.
Proof.
case: s1 s2 => [|x1 s1] [|x2 s2] //= sub_s12 /(subseq_order_path sub_s12).
by case: eqP => [-> | _ /andP[]].
Qed.
Lemma sorted_filter a s : sorted s -> sorted (filter a s).
Proof. exact: subseq_sorted (filter_subseq a s). Qed.
Lemma sorted_uniq : irreflexive leT -> forall s, sorted s -> uniq s.
Proof.
move=> leT_irr; elim=> //= x s IHs s_ord.
rewrite (IHs (path_sorted s_ord)) andbT; apply/negP=> s_x.
by case/allPn: (order_path_min s_ord); exists x; rewrite // leT_irr.
Qed.
Lemma eq_sorted : antisymmetric leT ->
forall s1 s2, sorted s1 -> sorted s2 -> perm_eq s1 s2 -> s1 = s2.
Proof.
move=> leT_asym; elim=> [|x1 s1 IHs1] s2 //= ord_s1 ord_s2 eq_s12.
by case: {+}s2 (perm_size eq_s12).
have s2_x1: x1 \in s2 by rewrite -(perm_mem eq_s12) mem_head.
case: s2 s2_x1 eq_s12 ord_s2 => //= x2 s2; rewrite in_cons.
case: eqP => [<- _| ne_x12 /= s2_x1] eq_s12 ord_s2.
by rewrite {IHs1}(IHs1 s2) ?(@path_sorted x1) // -(perm_cons x1).
case: (ne_x12); apply: leT_asym; rewrite (allP (order_path_min ord_s2)) //.
have: x2 \in x1 :: s1 by rewrite (perm_mem eq_s12) mem_head.
case/predU1P=> [eq_x12 | s1_x2]; first by case ne_x12.
by rewrite (allP (order_path_min ord_s1)).
Qed.
Lemma eq_sorted_irr : irreflexive leT ->
forall s1 s2, sorted s1 -> sorted s2 -> s1 =i s2 -> s1 = s2.
Proof.
move=> leT_irr s1 s2 s1_sort s2_sort eq_s12.
have: antisymmetric leT.
by move=> m n /andP[? ltnm]; case/idP: (leT_irr m); apply: leT_tr ltnm.
by move/eq_sorted; apply=> //; apply: uniq_perm => //; apply: sorted_uniq.
Qed.
End Transitive.
Hypothesis leT_total : total leT.
Fixpoint merge s1 :=
if s1 is x1 :: s1' then
let fix merge_s1 s2 :=
if s2 is x2 :: s2' then
if leT x2 x1 then x2 :: merge_s1 s2' else x1 :: merge s1' s2
else s1 in
merge_s1
else id.
Lemma merge_path x s1 s2 :
path leT x s1 -> path leT x s2 -> path leT x (merge s1 s2).
Proof.
elim: s1 s2 x => //= x1 s1 IHs1.
elim=> //= x2 s2 IHs2 x /andP[le_x_x1 ord_s1] /andP[le_x_x2 ord_s2].
case: ifP => le_x21 /=; first by rewrite le_x_x2 {}IHs2 // le_x21.
by rewrite le_x_x1 IHs1 //=; have:= leT_total x2 x1; rewrite le_x21 /= => ->.
Qed.
Lemma merge_sorted s1 s2 : sorted s1 -> sorted s2 -> sorted (merge s1 s2).
Proof.
case: s1 s2 => [|x1 s1] [|x2 s2] //= ord_s1 ord_s2.
case: ifP => le_x21 /=.
by apply: (@merge_path x2 (x1 :: s1)) => //=; rewrite le_x21.
by apply: merge_path => //=; have:= leT_total x2 x1; rewrite le_x21 /= => ->.
Qed.
Lemma perm_merge s1 s2 : perm_eql (merge s1 s2) (s1 ++ s2).
Proof.
apply/permPl; rewrite perm_sym; elim: s1 s2 => //= x1 s1 IHs1.
elim=> [|x2 s2 IHs2]; rewrite /= ?cats0 //.
case: ifP => _ /=; last by rewrite perm_cons.
by rewrite (perm_catCA (_ :: _) [::x2]) perm_cons.
Qed.
Lemma mem_merge s1 s2 : merge s1 s2 =i s1 ++ s2.
Proof. by apply: perm_mem; rewrite perm_merge. Qed.
Lemma size_merge s1 s2 : size (merge s1 s2) = size (s1 ++ s2).
Proof. by apply: perm_size; rewrite perm_merge. Qed.
Lemma merge_uniq s1 s2 : uniq (merge s1 s2) = uniq (s1 ++ s2).
Proof. by apply: perm_uniq; rewrite perm_merge. Qed.
Fixpoint merge_sort_push s1 ss :=
match ss with
| [::] :: ss' | [::] as ss' => s1 :: ss'
| s2 :: ss' => [::] :: merge_sort_push (merge s1 s2) ss'
end.
Fixpoint merge_sort_pop s1 ss :=
if ss is s2 :: ss' then merge_sort_pop (merge s1 s2) ss' else s1.
Fixpoint merge_sort_rec ss s :=
if s is [:: x1, x2 & s'] then
let s1 := if leT x1 x2 then [:: x1; x2] else [:: x2; x1] in
merge_sort_rec (merge_sort_push s1 ss) s'
else merge_sort_pop s ss.
Definition sort := merge_sort_rec [::].
Lemma sort_sorted s : sorted (sort s).
Proof.
rewrite /sort; have allss: all sorted [::] by [].
elim: {s}_.+1 {-2}s [::] allss (ltnSn (size s)) => // n IHn s ss allss.
have: sorted s -> sorted (merge_sort_pop s ss).
elim: ss allss s => //= s2 ss IHss /andP[ord_s2 ord_ss] s ord_s.
exact: IHss ord_ss _ (merge_sorted ord_s ord_s2).
case: s => [|x1 [|x2 s _]]; try by auto.
move/ltnW/IHn; apply=> {n IHn s}; set s1 := if _ then _ else _.
have: sorted s1 by apply: (@merge_sorted [::x2] [::x1]).
elim: ss {x1 x2}s1 allss => /= [|s2 ss IHss] s1; first by rewrite andbT.
case/andP=> ord_s2 ord_ss ord_s1.
by case: {1}s2=> /= [|_ _]; [rewrite ord_s1 | apply: IHss (merge_sorted _ _)].
Qed.
Lemma perm_sort s : perm_eql (sort s) s.
Proof.
rewrite /sort; apply/permPl; pose catss := foldr (@cat T) [::].
rewrite perm_sym -{1}[s]/(catss [::] ++ s).
elim: {s}_.+1 {-2}s [::] (ltnSn (size s)) => // n IHn s ss.
have: perm_eq (catss ss ++ s) (merge_sort_pop s ss).
elim: ss s => //= s2 ss IHss s1; rewrite -{IHss}(permPr (IHss _)).
by rewrite perm_catC catA perm_catC perm_cat2l -perm_merge.
case: s => // x1 [//|x2 s _]; move/ltnW; move/IHn=> {n IHn}IHs.
rewrite -{IHs}(permPr (IHs _)) ifE; set s1 := if_expr _ _ _.
rewrite (catA _ [:: _; _] s) {s}perm_cat2r.
apply: (@perm_trans _ (catss ss ++ s1)).
by rewrite perm_cat2l /s1 -ifE; case: ifP; rewrite // (perm_catC [:: _]).
elim: ss {x1 x2}s1 => /= [|s2 ss IHss] s1; first by rewrite cats0.
rewrite perm_catC; case def_s2: {2}s2=> /= [|y s2']; first by rewrite def_s2.
by rewrite catA -{IHss}(permPr (IHss _)) perm_catC perm_cat2l -perm_merge.
Qed.
Lemma mem_sort s : sort s =i s.
Proof. by apply: perm_mem; rewrite perm_sort. Qed.
Lemma size_sort s : size (sort s) = size s.
Proof. by apply: perm_size; rewrite perm_sort. Qed.
Lemma sort_uniq s : uniq (sort s) = uniq s.
Proof. by apply: perm_uniq; rewrite perm_sort. Qed.
Lemma perm_sortP : transitive leT -> antisymmetric leT ->
forall s1 s2, reflect (sort s1 = sort s2) (perm_eq s1 s2).
Proof.
move=> leT_tr leT_asym s1 s2.
apply: (iffP idP) => eq12; last by rewrite -perm_sort eq12 perm_sort.
apply: eq_sorted; rewrite ?sort_sorted //.
by rewrite perm_sort (permPl eq12) -perm_sort.
Qed.
End SortSeq.
Lemma rev_sorted (T : eqType) (leT : rel T) s :
sorted leT (rev s) = sorted (fun y x => leT x y) s.
Proof. by case: s => //= x p; rewrite -rev_path lastI rev_rcons. Qed.
Lemma ltn_sorted_uniq_leq s : sorted ltn s = uniq s && sorted leq s.
Proof.
case: s => //= n s; elim: s n => //= m s IHs n.
rewrite inE ltn_neqAle negb_or IHs -!andbA.
case sn: (n \in s); last do !bool_congr.
rewrite andbF; apply/and5P=> [[ne_nm lenm _ _ le_ms]]; case/negP: ne_nm.
by rewrite eqn_leq lenm; apply: (allP (order_path_min leq_trans le_ms)).
Qed.
Lemma iota_sorted i n : sorted leq (iota i n).
Proof. by elim: n i => // [[|n] //= IHn] i; rewrite IHn leqW. Qed.
Lemma iota_ltn_sorted i n : sorted ltn (iota i n).
Proof. by rewrite ltn_sorted_uniq_leq iota_sorted iota_uniq. Qed.
(* Function trajectories. *)
Notation fpath f := (path (coerced_frel f)).
Notation fcycle f := (cycle (coerced_frel f)).
Notation ufcycle f := (ucycle (coerced_frel f)).
Prenex Implicits path next prev cycle ucycle mem2.
Section Trajectory.
Variables (T : Type) (f : T -> T).
Fixpoint traject x n := if n is n'.+1 then x :: traject (f x) n' else [::].
Lemma trajectS x n : traject x n.+1 = x :: traject (f x) n.
Proof. by []. Qed.
Lemma trajectSr x n : traject x n.+1 = rcons (traject x n) (iter n f x).
Proof. by elim: n x => //= n IHn x; rewrite IHn -iterSr. Qed.
Lemma last_traject x n : last x (traject (f x) n) = iter n f x.
Proof. by case: n => // n; rewrite iterSr trajectSr last_rcons. Qed.
Lemma traject_iteri x n :
traject x n = iteri n (fun i => rcons^~ (iter i f x)) [::].
Proof. by elim: n => //= n <-; rewrite -trajectSr. Qed.
Lemma size_traject x n : size (traject x n) = n.
Proof. by elim: n x => //= n IHn x //=; rewrite IHn. Qed.
Lemma nth_traject i n : i < n -> forall x, nth x (traject x n) i = iter i f x.
Proof.
elim: n => // n IHn; rewrite ltnS leq_eqVlt => le_i_n x.
rewrite trajectSr nth_rcons size_traject.
by case: ltngtP le_i_n => [? _||->] //; apply: IHn.
Qed.
End Trajectory.
Section EqTrajectory.
Variables (T : eqType) (f : T -> T).
Lemma eq_fpath f' : f =1 f' -> fpath f =2 fpath f'.
Proof. by move/eq_frel/eq_path. Qed.
Lemma eq_fcycle f' : f =1 f' -> fcycle f =1 fcycle f'.
Proof. by move/eq_frel/eq_cycle. Qed.
Lemma fpathP x p : reflect (exists n, p = traject f (f x) n) (fpath f x p).
Proof.
elim: p x => [|y p IHp] x; first by left; exists 0.
rewrite /= andbC; case: IHp => [fn_p | not_fn_p]; last first.
by right=> [] [[//|n]] [<- fn_p]; case: not_fn_p; exists n.
apply: (iffP eqP) => [-> | [[] // _ []//]].
by have [n ->] := fn_p; exists n.+1.
Qed.
Lemma fpath_traject x n : fpath f x (traject f (f x) n).
Proof. by apply/(fpathP x); exists n. Qed.
Definition looping x n := iter n f x \in traject f x n.
Lemma loopingP x n :
reflect (forall m, iter m f x \in traject f x n) (looping x n).
Proof.
apply: (iffP idP) => loop_n; last exact: loop_n.
case: n => // n in loop_n *; elim=> [|m /= IHm]; first exact: mem_head.
move: (fpath_traject x n) loop_n; rewrite /looping !iterS -last_traject /=.
move: (iter m f x) IHm => y /splitPl[p1 p2 def_y].
rewrite cat_path last_cat def_y; case: p2 => // z p2 /and3P[_ /eqP-> _] _.
by rewrite inE mem_cat mem_head !orbT.
Qed.
Lemma trajectP x n y :
reflect (exists2 i, i < n & y = iter i f x) (y \in traject f x n).
Proof.
elim: n x => [|n IHn] x /=; first by right; case.
rewrite inE; have [-> | /= neq_xy] := eqP; first by left; exists 0.
apply: {IHn}(iffP (IHn _)) => [[i] | [[|i]]] // lt_i_n ->.
by exists i.+1; rewrite ?iterSr.
by exists i; rewrite ?iterSr.
Qed.
Lemma looping_uniq x n : uniq (traject f x n.+1) = ~~ looping x n.
Proof.
rewrite /looping; elim: n x => [|n IHn] x //.
rewrite {-3}[n.+1]lock /= -lock {}IHn -iterSr -negb_or inE; congr (~~ _).
apply: orb_id2r => /trajectP no_loop.
apply/idP/eqP => [/trajectP[m le_m_n def_x] | {1}<-]; last first.
by rewrite iterSr -last_traject mem_last.
have loop_m: looping x m.+1 by rewrite /looping iterSr -def_x mem_head.
have/trajectP[[|i] // le_i_m def_fn1x] := loopingP _ _ loop_m n.+1.
by case: no_loop; exists i; rewrite -?iterSr // -ltnS (leq_trans le_i_m).
Qed.
End EqTrajectory.
Arguments fpathP {T f x p}.
Arguments loopingP {T f x n}.
Arguments trajectP {T f x n y}.
Prenex Implicits traject.
Section UniqCycle.
Variables (n0 : nat) (T : eqType) (e : rel T) (p : seq T).
Hypothesis Up : uniq p.
Lemma prev_next : cancel (next p) (prev p).
Proof.
move=> x; rewrite prev_nth mem_next next_nth; case p_x: (x \in p) => //.
case def_p: p Up p_x => // [y q]; rewrite -{-1}def_p => /= /andP[not_qy Uq] p_x.
rewrite -{2}(nth_index y p_x); congr (nth y _ _); set i := index x p.
have: ~~ (size q < i) by rewrite -index_mem -/i def_p leqNgt in p_x.
case: ltngtP => // [lt_i_q | ->] _; first by rewrite index_uniq.
by apply/eqP; rewrite nth_default // eqn_leq index_size leqNgt index_mem.
Qed.
Lemma next_prev : cancel (prev p) (next p).
Proof.
move=> x; rewrite next_nth mem_prev prev_nth; case p_x: (x \in p) => //.
case def_p: p p_x => // [y q]; rewrite -def_p => p_x.
rewrite index_uniq //; last by rewrite def_p ltnS index_size.
case q_x: (x \in q); first exact: nth_index.
rewrite nth_default; last by rewrite leqNgt index_mem q_x.
by apply/eqP; rewrite def_p inE q_x orbF eq_sym in p_x.
Qed.
Lemma cycle_next : fcycle (next p) p.
Proof.
case def_p: {-2}p Up => [|x q] Uq //.
apply/(pathP x)=> i; rewrite size_rcons => le_i_q.
rewrite -cats1 -cat_cons nth_cat le_i_q /= next_nth {}def_p mem_nth //.
rewrite index_uniq // nth_cat /= ltn_neqAle andbC -ltnS le_i_q.
by case: (i =P _) => //= ->; rewrite subnn nth_default.
Qed.
Lemma cycle_prev : cycle (fun x y => x == prev p y) p.
Proof.
apply: etrans cycle_next; symmetry; case def_p: p => [|x q] //.
by apply: eq_path; rewrite -def_p; apply: (can2_eq prev_next next_prev).
Qed.
Lemma cycle_from_next : (forall x, x \in p -> e x (next p x)) -> cycle e p.
Proof.
case: p (next p) cycle_next => //= [x q] n; rewrite -(belast_rcons x q x).
move: {q}(rcons q x) => q n_q; move/allP.
by elim: q x n_q => //= _ q IHq x /andP[/eqP <- n_q] /andP[-> /IHq->].
Qed.
Lemma cycle_from_prev : (forall x, x \in p -> e (prev p x) x) -> cycle e p.
Proof.
move=> e_p; apply: cycle_from_next => x p_x.
by rewrite -{1}[x]prev_next e_p ?mem_next.
Qed.
Lemma next_rot : next (rot n0 p) =1 next p.
Proof.
move=> x; have n_p := cycle_next; rewrite -(rot_cycle n0) in n_p.
case p_x: (x \in p); last by rewrite !next_nth mem_rot p_x.
by rewrite (eqP (next_cycle n_p _)) ?mem_rot.
Qed.
Lemma prev_rot : prev (rot n0 p) =1 prev p.
Proof.
move=> x; have p_p := cycle_prev; rewrite -(rot_cycle n0) in p_p.
case p_x: (x \in p); last by rewrite !prev_nth mem_rot p_x.
by rewrite (eqP (prev_cycle p_p _)) ?mem_rot.
Qed.
End UniqCycle.
Section UniqRotrCycle.
Variables (n0 : nat) (T : eqType) (p : seq T).
Hypothesis Up : uniq p.
Lemma next_rotr : next (rotr n0 p) =1 next p. Proof. exact: next_rot. Qed.
Lemma prev_rotr : prev (rotr n0 p) =1 prev p. Proof. exact: prev_rot. Qed.
End UniqRotrCycle.
Section UniqCycleRev.
Variable T : eqType.
Implicit Type p : seq T.
Lemma prev_rev p : uniq p -> prev (rev p) =1 next p.
Proof.
move=> Up x; case p_x: (x \in p); last first.
by rewrite next_nth prev_nth mem_rev p_x.
case/rot_to: p_x (Up) => [i q def_p] Urp; rewrite -rev_uniq in Urp.
rewrite -(prev_rotr i Urp); do 2 rewrite -(prev_rotr 1) ?rotr_uniq //.
rewrite -rev_rot -(next_rot i Up) {i p Up Urp}def_p.
by case: q => // y q; rewrite !rev_cons !(=^~ rcons_cons, rotr1_rcons) /= eqxx.
Qed.
Lemma next_rev p : uniq p -> next (rev p) =1 prev p.
Proof. by move=> Up x; rewrite -{2}[p]revK prev_rev // rev_uniq. Qed.
End UniqCycleRev.
Section MapPath.
Variables (T T' : Type) (h : T' -> T) (e : rel T) (e' : rel T').
Definition rel_base (b : pred T) :=
forall x' y', ~~ b (h x') -> e (h x') (h y') = e' x' y'.
Lemma map_path b x' p' (Bb : rel_base b) :
~~ has (preim h b) (belast x' p') ->
path e (h x') (map h p') = path e' x' p'.
Proof. by elim: p' x' => [|y' p' IHp'] x' //= /norP[/Bb-> /IHp'->]. Qed.
End MapPath.
Section MapEqPath.
Variables (T T' : eqType) (h : T' -> T) (e : rel T) (e' : rel T').
Hypothesis Ih : injective h.
Lemma mem2_map x' y' p' : mem2 (map h p') (h x') (h y') = mem2 p' x' y'.
Proof. by rewrite {1}/mem2 (index_map Ih) -map_drop mem_map. Qed.
Lemma next_map p : uniq p -> forall x, next (map h p) (h x) = h (next p x).
Proof.
move=> Up x; case p_x: (x \in p); last by rewrite !next_nth (mem_map Ih) p_x.
case/rot_to: p_x => i p' def_p.
rewrite -(next_rot i Up); rewrite -(map_inj_uniq Ih) in Up.
rewrite -(next_rot i Up) -map_rot {i p Up}def_p /=.
by case: p' => [|y p''] //=; rewrite !eqxx.
Qed.
Lemma prev_map p : uniq p -> forall x, prev (map h p) (h x) = h (prev p x).
Proof.
move=> Up x; rewrite -{1}[x](next_prev Up) -(next_map Up).
by rewrite prev_next ?map_inj_uniq.
Qed.
End MapEqPath.
Definition fun_base (T T' : eqType) (h : T' -> T) f f' :=
rel_base h (frel f) (frel f').
Section CycleArc.
Variable T : eqType.
Implicit Type p : seq T.
Definition arc p x y := let px := rot (index x p) p in take (index y px) px.
Lemma arc_rot i p : uniq p -> {in p, arc (rot i p) =2 arc p}.
Proof.
move=> Up x p_x y; congr (fun q => take (index y q) q); move: Up p_x {y}.
rewrite -{1 2 5 6}(cat_take_drop i p) /rot cat_uniq => /and3P[_ Up12 _].
rewrite !drop_cat !take_cat !index_cat mem_cat orbC.
case p2x: (x \in drop i p) => /= => [_ | p1x].
rewrite index_mem p2x [x \in _](negbTE (hasPn Up12 _ p2x)) /= addKn.
by rewrite ltnNge leq_addr catA.
by rewrite p1x index_mem p1x addKn ltnNge leq_addr /= catA.
Qed.
Lemma left_arc x y p1 p2 (p := x :: p1 ++ y :: p2) :
uniq p -> arc p x y = x :: p1.
Proof.
rewrite /arc /p [index x _]/= eqxx rot0 -cat_cons cat_uniq index_cat.
move: (x :: p1) => xp1 /and3P[_ /norP[/= /negbTE-> _] _].
by rewrite eqxx addn0 take_size_cat.
Qed.
Lemma right_arc x y p1 p2 (p := x :: p1 ++ y :: p2) :
uniq p -> arc p y x = y :: p2.
Proof.
rewrite -[p]cat_cons -rot_size_cat rot_uniq => Up.
by rewrite arc_rot ?left_arc ?mem_head.
Qed.
Variant rot_to_arc_spec p x y :=
RotToArcSpec i p1 p2 of x :: p1 = arc p x y
& y :: p2 = arc p y x
& rot i p = x :: p1 ++ y :: p2 :
rot_to_arc_spec p x y.
Lemma rot_to_arc p x y :
uniq p -> x \in p -> y \in p -> x != y -> rot_to_arc_spec p x y.
Proof.
move=> Up p_x p_y ne_xy; case: (rot_to p_x) (p_y) (Up) => [i q def_p] q_y.
rewrite -(mem_rot i) def_p inE eq_sym (negbTE ne_xy) in q_y.
rewrite -(rot_uniq i) def_p.
case/splitPr: q / q_y def_p => q1 q2 def_p Uq12; exists i q1 q2 => //.
by rewrite -(arc_rot i Up p_x) def_p left_arc.
by rewrite -(arc_rot i Up p_y) def_p right_arc.
Qed.
End CycleArc.
Prenex Implicits arc.
Section Monotonicity.
Variables (T : eqType) (r : rel T).
Hypothesis r_trans : transitive r.
Lemma sorted_lt_nth x0 (s : seq T) : sorted r s ->
{in [pred n | n < size s] &, {homo nth x0 s : i j / i < j >-> r i j}}.
Proof.
move=> s_sorted i j; rewrite -!topredE /=.
wlog ->: i j s s_sorted / i = 0 => [/(_ 0 (j - i) (drop i s)) hw|] ilt jlt ltij.
move: hw; rewrite !size_drop !nth_drop addn0 subnKC ?(ltnW ltij) //.
by rewrite (subseq_sorted _ (drop_subseq _ _)) ?subn_gt0 ?ltn_sub2r//; apply.
case: s ilt j jlt ltij => [|x s] //= _ [//|j] jlt _ in s_sorted *.
by have /allP -> //= := order_path_min r_trans s_sorted; rewrite mem_nth.
Qed.
Lemma ltn_index (s : seq T) : sorted r s ->
{in s &, forall x y, index x s < index y s -> r x y}.
Proof.
case: s => [//|x0 s'] r_sorted x y xs ys.
move=> /(@sorted_lt_nth x0 (x0 :: s')).
by rewrite ?nth_index ?[_ \in gtn _]index_mem //; apply.
Qed.
Hypothesis r_refl : reflexive r.
Lemma sorted_le_nth x0 (s : seq T) : sorted r s ->
{in [pred n | n < size s] &, {homo nth x0 s : i j / i <= j >-> r i j}}.
Proof.
move=> s_sorted x y xs ys.
by rewrite leq_eqVlt=> /orP[/eqP->//|/sorted_lt_nth]; apply.
Qed.
Lemma leq_index (s : seq T) : sorted r s ->
{in s &, forall x y, index x s <= index y s -> r x y}.
Proof.
case: s => [//|x0 s'] r_sorted x y xs ys.
move=> /(@sorted_le_nth x0 (x0 :: s')).
by rewrite ?nth_index ?[_ \in gtn _]index_mem //; apply.
Qed.
End Monotonicity.
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