Library iris.prelude.vector
This file collects general purpose definitions and theorems on vectors
(lists of fixed length) and the fin type (bounded naturals). It uses the
definitions from the standard library, but renames or changes their notations,
so that it becomes more consistent with the naming conventions in this
development.
The fin type
The type fin n represents natural numbers i with 0 ≤ i < n. We define a scope fin, in which we declare notations for small literals of the fin type. Whereas the standard library starts counting at 1, we start counting at 0. This way, the embedding fin_to_nat preserves 0, and allows us to define fin_to_nat as a coercion without introducing notational ambiguity.
Notation fin := Fin.t.
Notation FS := Fin.FS.
Delimit Scope fin_scope with fin.
Arguments Fin.FS _ _%fin.
Notation "0" := Fin.F1 : fin_scope. Notation "1" := (FS 0) : fin_scope.
Notation "2" := (FS 1) : fin_scope. Notation "3" := (FS 2) : fin_scope.
Notation "4" := (FS 3) : fin_scope. Notation "5" := (FS 4) : fin_scope.
Notation "6" := (FS 5) : fin_scope. Notation "7" := (FS 6) : fin_scope.
Notation "8" := (FS 7) : fin_scope. Notation "9" := (FS 8) : fin_scope.
Notation "10" := (FS 9) : fin_scope.
Fixpoint fin_to_nat {n} (i : fin n) : nat :=
match i with 0%fin ⇒ 0 | FS _ i ⇒ S (fin_to_nat i) end.
Coercion fin_to_nat : fin >-> nat.
Notation fin_of_nat := Fin.of_nat_lt.
Notation fin_rect2 := Fin.rect2.
Instance fin_dec {n} : ∀ i j : fin n, Decision (i = j).
Proof.
refine (fin_rect2
(λ n (i j : fin n), { i = j } + { i ≠ j })
(λ _, left _)
(λ _ _, right _)
(λ _ _, right _)
(λ _ _ _ H, cast_if H));
abstract (f_equal; by auto using Fin.FS_inj).
Defined.
Notation FS := Fin.FS.
Delimit Scope fin_scope with fin.
Arguments Fin.FS _ _%fin.
Notation "0" := Fin.F1 : fin_scope. Notation "1" := (FS 0) : fin_scope.
Notation "2" := (FS 1) : fin_scope. Notation "3" := (FS 2) : fin_scope.
Notation "4" := (FS 3) : fin_scope. Notation "5" := (FS 4) : fin_scope.
Notation "6" := (FS 5) : fin_scope. Notation "7" := (FS 6) : fin_scope.
Notation "8" := (FS 7) : fin_scope. Notation "9" := (FS 8) : fin_scope.
Notation "10" := (FS 9) : fin_scope.
Fixpoint fin_to_nat {n} (i : fin n) : nat :=
match i with 0%fin ⇒ 0 | FS _ i ⇒ S (fin_to_nat i) end.
Coercion fin_to_nat : fin >-> nat.
Notation fin_of_nat := Fin.of_nat_lt.
Notation fin_rect2 := Fin.rect2.
Instance fin_dec {n} : ∀ i j : fin n, Decision (i = j).
Proof.
refine (fin_rect2
(λ n (i j : fin n), { i = j } + { i ≠ j })
(λ _, left _)
(λ _ _, right _)
(λ _ _, right _)
(λ _ _ _ H, cast_if H));
abstract (f_equal; by auto using Fin.FS_inj).
Defined.
The inversion principle fin_S_inv is more convenient than its variant
Fin.caseS in the standard library, as we keep the parameter n fixed.
In the tactic inv_fin i to perform dependent case analysis on i, we
therefore do not have to generalize over the index n and all assumptions
depending on it. Notice that contrary to dependent destruction, which uses
the JMeq_eq axiom, the tactic inv_fin produces axiom free proofs.
Notation fin_0_inv := Fin.case0.
Definition fin_S_inv {n} (P : fin (S n) → Type)
(H0 : P 0%fin) (HS : ∀ i, P (FS i)) (i : fin (S n)) : P i.
Proof.
revert P H0 HS.
refine match i with 0%fin ⇒ λ _ H0 _, H0 | FS _ i ⇒ λ _ _ HS, HS i end.
Defined.
Ltac inv_fin i :=
match type of i with
| fin 0 ⇒
revert dependent i; match goal with |- ∀ i, @?P i ⇒ apply (fin_0_inv P) end
| fin (S ?n) ⇒
revert dependent i; match goal with |- ∀ i, @?P i ⇒ apply (fin_S_inv P) end
end.
Instance: Inj (=) (=) (@FS n).
Proof. intros n i j. apply Fin.FS_inj. Qed.
Instance: Inj (=) (=) (@fin_to_nat n).
Proof.
intros n i. induction i; intros j; inv_fin j; intros; f_equal/=; auto with lia.
Qed.
Lemma fin_to_nat_lt {n} (i : fin n) : fin_to_nat i < n.
Proof. induction i; simpl; lia. Qed.
Lemma fin_to_of_nat n m (H : n < m) : fin_to_nat (Fin.of_nat_lt H) = n.
Proof.
revert m H. induction n; intros [|?]; simpl; auto; intros; exfalso; lia.
Qed.
Definition fin_S_inv {n} (P : fin (S n) → Type)
(H0 : P 0%fin) (HS : ∀ i, P (FS i)) (i : fin (S n)) : P i.
Proof.
revert P H0 HS.
refine match i with 0%fin ⇒ λ _ H0 _, H0 | FS _ i ⇒ λ _ _ HS, HS i end.
Defined.
Ltac inv_fin i :=
match type of i with
| fin 0 ⇒
revert dependent i; match goal with |- ∀ i, @?P i ⇒ apply (fin_0_inv P) end
| fin (S ?n) ⇒
revert dependent i; match goal with |- ∀ i, @?P i ⇒ apply (fin_S_inv P) end
end.
Instance: Inj (=) (=) (@FS n).
Proof. intros n i j. apply Fin.FS_inj. Qed.
Instance: Inj (=) (=) (@fin_to_nat n).
Proof.
intros n i. induction i; intros j; inv_fin j; intros; f_equal/=; auto with lia.
Qed.
Lemma fin_to_nat_lt {n} (i : fin n) : fin_to_nat i < n.
Proof. induction i; simpl; lia. Qed.
Lemma fin_to_of_nat n m (H : n < m) : fin_to_nat (Fin.of_nat_lt H) = n.
Proof.
revert m H. induction n; intros [|?]; simpl; auto; intros; exfalso; lia.
Qed.
Vectors
The type vec n represents lists of consisting of exactly n elements. Whereas the standard library declares exactly the same notations for vectors as used for lists, we use slightly different notations so it becomes easier to use lists and vectors together.
Notation vec := Vector.t.
Notation vnil := Vector.nil.
Arguments vnil {_}.
Notation vcons := Vector.cons.
Notation vapp := Vector.append.
Arguments vcons {_} _ {_} _.
Infix ":::" := vcons (at level 60, right associativity) : vector_scope.
Notation "(:::)" := vcons (only parsing) : vector_scope.
Notation "( x :::)" := (vcons x) (only parsing) : vector_scope.
Notation "(::: v )" := (λ x, vcons x v) (only parsing) : vector_scope.
Notation "[# ] " := vnil : vector_scope.
Notation "[# x ] " := (vcons x vnil) : vector_scope.
Notation "[# x ; .. ; y ] " := (vcons x .. (vcons y vnil) ..) : vector_scope.
Infix "+++" := vapp (at level 60, right associativity) : vector_scope.
Notation "(+++)" := vapp (only parsing) : vector_scope.
Notation "( v +++)" := (vapp v) (only parsing) : vector_scope.
Notation "(+++ w )" := (λ v, vapp v w) (only parsing) : vector_scope.
Notation vnil := Vector.nil.
Arguments vnil {_}.
Notation vcons := Vector.cons.
Notation vapp := Vector.append.
Arguments vcons {_} _ {_} _.
Infix ":::" := vcons (at level 60, right associativity) : vector_scope.
Notation "(:::)" := vcons (only parsing) : vector_scope.
Notation "( x :::)" := (vcons x) (only parsing) : vector_scope.
Notation "(::: v )" := (λ x, vcons x v) (only parsing) : vector_scope.
Notation "[# ] " := vnil : vector_scope.
Notation "[# x ] " := (vcons x vnil) : vector_scope.
Notation "[# x ; .. ; y ] " := (vcons x .. (vcons y vnil) ..) : vector_scope.
Infix "+++" := vapp (at level 60, right associativity) : vector_scope.
Notation "(+++)" := vapp (only parsing) : vector_scope.
Notation "( v +++)" := (vapp v) (only parsing) : vector_scope.
Notation "(+++ w )" := (λ v, vapp v w) (only parsing) : vector_scope.
Notice that we cannot define Vector.nth as an instance of our Lookup
type class, as it has a dependent type.
The tactic vec_double_ind v1 v2 performs double induction on v1 and v2
provided that they have the same length.
Notation vec_rect2 := Vector.rect2.
Ltac vec_double_ind v1 v2 :=
match type of v1 with
| vec _ ?n ⇒
repeat match goal with
| H' : context [ n ] |- _ ⇒ var_neq v1 H'; var_neq v2 H'; revert H'
end;
revert n v1 v2;
match goal with |- ∀ n v1 v2, @?P n v1 v2 ⇒ apply (vec_rect2 P) end
end.
Notation vcons_inj := VectorSpec.cons_inj.
Lemma vcons_inj_1 {A n} x y (v w : vec A n) : x ::: v = y ::: w → x = y.
Proof. apply vcons_inj. Qed.
Lemma vcons_inj_2 {A n} x y (v w : vec A n) : x ::: v = y ::: w → v = w.
Proof. apply vcons_inj. Qed.
Lemma vec_eq {A n} (v w : vec A n) : (∀ i, v !!! i = w !!! i) → v = w.
Proof.
vec_double_ind v w; [done|]. intros n v w IH x y Hi. f_equal.
- apply (Hi 0%fin).
- apply IH. intros i. apply (Hi (FS i)).
Qed.
Instance vec_dec {A} {dec : ∀ x y : A, Decision (x = y)} {n} :
∀ v w : vec A n, Decision (v = w).
Proof.
refine (vec_rect2
(λ n (v w : vec A n), { v = w } + { v ≠ w })
(left _)
(λ _ _ _ H x y, cast_if_and (dec x y) H));
f_equal; eauto using vcons_inj_1, vcons_inj_2.
Defined.
Ltac vec_double_ind v1 v2 :=
match type of v1 with
| vec _ ?n ⇒
repeat match goal with
| H' : context [ n ] |- _ ⇒ var_neq v1 H'; var_neq v2 H'; revert H'
end;
revert n v1 v2;
match goal with |- ∀ n v1 v2, @?P n v1 v2 ⇒ apply (vec_rect2 P) end
end.
Notation vcons_inj := VectorSpec.cons_inj.
Lemma vcons_inj_1 {A n} x y (v w : vec A n) : x ::: v = y ::: w → x = y.
Proof. apply vcons_inj. Qed.
Lemma vcons_inj_2 {A n} x y (v w : vec A n) : x ::: v = y ::: w → v = w.
Proof. apply vcons_inj. Qed.
Lemma vec_eq {A n} (v w : vec A n) : (∀ i, v !!! i = w !!! i) → v = w.
Proof.
vec_double_ind v w; [done|]. intros n v w IH x y Hi. f_equal.
- apply (Hi 0%fin).
- apply IH. intros i. apply (Hi (FS i)).
Qed.
Instance vec_dec {A} {dec : ∀ x y : A, Decision (x = y)} {n} :
∀ v w : vec A n, Decision (v = w).
Proof.
refine (vec_rect2
(λ n (v w : vec A n), { v = w } + { v ≠ w })
(left _)
(λ _ _ _ H x y, cast_if_and (dec x y) H));
f_equal; eauto using vcons_inj_1, vcons_inj_2.
Defined.
Similar to fin, we provide an inversion principle that keeps the length
fixed. We define a tactic inv_vec v to perform case analysis on v, using
this inversion principle.
Notation vec_0_inv := Vector.case0.
Definition vec_S_inv {A n} (P : vec A (S n) → Type)
(Hcons : ∀ x v, P (x ::: v)) v : P v.
Proof.
revert P Hcons.
refine match v with [#] ⇒ tt | x ::: v ⇒ λ P Hcons, Hcons x v end.
Defined.
Ltac inv_vec v :=
match type of v with
| vec _ 0 ⇒
revert dependent v; match goal with |- ∀ v, @?P v ⇒ apply (vec_0_inv P) end
| vec _ (S ?n) ⇒
revert dependent v; match goal with |- ∀ v, @?P v ⇒ apply (vec_S_inv P) end
end.
Definition vec_S_inv {A n} (P : vec A (S n) → Type)
(Hcons : ∀ x v, P (x ::: v)) v : P v.
Proof.
revert P Hcons.
refine match v with [#] ⇒ tt | x ::: v ⇒ λ P Hcons, Hcons x v end.
Defined.
Ltac inv_vec v :=
match type of v with
| vec _ 0 ⇒
revert dependent v; match goal with |- ∀ v, @?P v ⇒ apply (vec_0_inv P) end
| vec _ (S ?n) ⇒
revert dependent v; match goal with |- ∀ v, @?P v ⇒ apply (vec_S_inv P) end
end.
The following tactic performs case analysis on all hypotheses of the shape
fin 0, fin (S n), vec A 0 and vec A (S n) until no further case
analyses are possible.
Ltac inv_all_vec_fin := block_goal;
repeat match goal with
| v : vec _ _ |- _ ⇒ inv_vec v; intros
| i : fin _ |- _ ⇒ inv_fin i; intros
end; unblock_goal.
repeat match goal with
| v : vec _ _ |- _ ⇒ inv_vec v; intros
| i : fin _ |- _ ⇒ inv_fin i; intros
end; unblock_goal.
We define a coercion from vec to list and show that it preserves the
operations on vectors. We also define a function to go in the other way, but
do not define it as a coercion, as it would otherwise introduce ambiguity.
Fixpoint vec_to_list {A n} (v : vec A n) : list A :=
match v with [#] ⇒ [] | x ::: v ⇒ x :: vec_to_list v end.
Coercion vec_to_list : vec >-> list.
Notation list_to_vec := Vector.of_list.
Lemma vec_to_list_cons {A n} x (v : vec A n) :
vec_to_list (x ::: v) = x :: vec_to_list v.
Proof. done. Qed.
Lemma vec_to_list_app {A n m} (v : vec A n) (w : vec A m) :
vec_to_list (v +++ w) = vec_to_list v ++ vec_to_list w.
Proof. by induction v; f_equal/=. Qed.
Lemma vec_to_list_of_list {A} (l : list A): vec_to_list (list_to_vec l) = l.
Proof. by induction l; f_equal/=. Qed.
Lemma vec_to_list_length {A n} (v : vec A n) : length (vec_to_list v) = n.
Proof. induction v; simpl; by f_equal. Qed.
Lemma vec_to_list_same_length {A B n} (v : vec A n) (w : vec B n) :
length v = length w.
Proof. by rewrite !vec_to_list_length. Qed.
Lemma vec_to_list_inj1 {A n m} (v : vec A n) (w : vec A m) :
vec_to_list v = vec_to_list w → n = m.
Proof.
revert m w. induction v; intros ? [|???] ?;
simplify_eq/=; f_equal; eauto.
Qed.
Lemma vec_to_list_inj2 {A n} (v : vec A n) (w : vec A n) :
vec_to_list v = vec_to_list w → v = w.
Proof.
revert w. induction v; intros w; inv_vec w; intros;
simplify_eq/=; f_equal; eauto.
Qed.
Lemma vlookup_middle {A n m} (v : vec A n) (w : vec A m) x :
∃ i : fin (n + S m), x = (v +++ x ::: w) !!! i.
Proof.
induction v; simpl; [by eexists 0%fin|].
destruct IHv as [i ?]. by ∃ (FS i).
Qed.
Lemma vec_to_list_lookup_middle {A n} (v : vec A n) (l k : list A) x :
vec_to_list v = l ++ x :: k →
∃ i : fin n, l = take i v ∧ x = v !!! i ∧ k = drop (S i) v.
Proof.
intros H.
rewrite <-(vec_to_list_of_list l), <-(vec_to_list_of_list k) in H.
rewrite <-vec_to_list_cons, <-vec_to_list_app in H.
pose proof (vec_to_list_inj1 _ _ H); subst.
apply vec_to_list_inj2 in H; subst. induction l. simpl.
- eexists 0%fin. simpl. by rewrite vec_to_list_of_list.
- destruct IHl as [i ?]. ∃ (FS i). simpl. intuition congruence.
Qed.
Lemma vec_to_list_drop_lookup {A n} (v : vec A n) (i : fin n) :
drop i v = v !!! i :: drop (S i) v.
Proof. induction i; inv_vec v; simpl; intros; [done | by rewrite IHi]. Qed.
Lemma vec_to_list_take_drop_lookup {A n} (v : vec A n) (i : fin n) :
vec_to_list v = take i v ++ v !!! i :: drop (S i) v.
Proof. rewrite <-(take_drop i v) at 1. by rewrite vec_to_list_drop_lookup. Qed.
Lemma elem_of_vlookup {A n} (v : vec A n) x :
x ∈ vec_to_list v ↔ ∃ i, v !!! i = x.
Proof.
split.
- induction v; simpl; [by rewrite elem_of_nil |].
inversion 1; subst; [by eexists 0%fin|].
destruct IHv as [i ?]; trivial. by ∃ (FS i).
- intros [i ?]; subst. induction v as [|??? IH]; inv_fin i; [by left|].
right; apply IH.
Qed.
Lemma Forall_vlookup {A} (P : A → Prop) {n} (v : vec A n) :
Forall P (vec_to_list v) ↔ ∀ i, P (v !!! i).
Proof. rewrite Forall_forall. setoid_rewrite elem_of_vlookup. naive_solver. Qed.
Lemma Forall_vlookup_1 {A} (P : A → Prop) {n} (v : vec A n) i :
Forall P (vec_to_list v) → P (v !!! i).
Proof. by rewrite Forall_vlookup. Qed.
Lemma Forall_vlookup_2 {A} (P : A → Prop) {n} (v : vec A n) :
(∀ i, P (v !!! i)) → Forall P (vec_to_list v).
Proof. by rewrite Forall_vlookup. Qed.
Lemma Exists_vlookup {A} (P : A → Prop) {n} (v : vec A n) :
Exists P (vec_to_list v) ↔ ∃ i, P (v !!! i).
Proof. rewrite Exists_exists. setoid_rewrite elem_of_vlookup. naive_solver. Qed.
Lemma Forall2_vlookup {A B} (P : A → B → Prop) {n}
(v1 : vec A n) (v2 : vec B n) :
Forall2 P (vec_to_list v1) (vec_to_list v2) ↔ ∀ i, P (v1 !!! i) (v2 !!! i).
Proof.
split.
- vec_double_ind v1 v2; [intros _ i; inv_fin i |].
intros n v1 v2 IH a b; simpl. inversion_clear 1.
intros i. inv_fin i; simpl; auto.
- vec_double_ind v1 v2; [constructor|].
intros ??? IH ?? H. constructor. apply (H 0%fin). apply IH, (λ i, H (FS i)).
Qed.
match v with [#] ⇒ [] | x ::: v ⇒ x :: vec_to_list v end.
Coercion vec_to_list : vec >-> list.
Notation list_to_vec := Vector.of_list.
Lemma vec_to_list_cons {A n} x (v : vec A n) :
vec_to_list (x ::: v) = x :: vec_to_list v.
Proof. done. Qed.
Lemma vec_to_list_app {A n m} (v : vec A n) (w : vec A m) :
vec_to_list (v +++ w) = vec_to_list v ++ vec_to_list w.
Proof. by induction v; f_equal/=. Qed.
Lemma vec_to_list_of_list {A} (l : list A): vec_to_list (list_to_vec l) = l.
Proof. by induction l; f_equal/=. Qed.
Lemma vec_to_list_length {A n} (v : vec A n) : length (vec_to_list v) = n.
Proof. induction v; simpl; by f_equal. Qed.
Lemma vec_to_list_same_length {A B n} (v : vec A n) (w : vec B n) :
length v = length w.
Proof. by rewrite !vec_to_list_length. Qed.
Lemma vec_to_list_inj1 {A n m} (v : vec A n) (w : vec A m) :
vec_to_list v = vec_to_list w → n = m.
Proof.
revert m w. induction v; intros ? [|???] ?;
simplify_eq/=; f_equal; eauto.
Qed.
Lemma vec_to_list_inj2 {A n} (v : vec A n) (w : vec A n) :
vec_to_list v = vec_to_list w → v = w.
Proof.
revert w. induction v; intros w; inv_vec w; intros;
simplify_eq/=; f_equal; eauto.
Qed.
Lemma vlookup_middle {A n m} (v : vec A n) (w : vec A m) x :
∃ i : fin (n + S m), x = (v +++ x ::: w) !!! i.
Proof.
induction v; simpl; [by eexists 0%fin|].
destruct IHv as [i ?]. by ∃ (FS i).
Qed.
Lemma vec_to_list_lookup_middle {A n} (v : vec A n) (l k : list A) x :
vec_to_list v = l ++ x :: k →
∃ i : fin n, l = take i v ∧ x = v !!! i ∧ k = drop (S i) v.
Proof.
intros H.
rewrite <-(vec_to_list_of_list l), <-(vec_to_list_of_list k) in H.
rewrite <-vec_to_list_cons, <-vec_to_list_app in H.
pose proof (vec_to_list_inj1 _ _ H); subst.
apply vec_to_list_inj2 in H; subst. induction l. simpl.
- eexists 0%fin. simpl. by rewrite vec_to_list_of_list.
- destruct IHl as [i ?]. ∃ (FS i). simpl. intuition congruence.
Qed.
Lemma vec_to_list_drop_lookup {A n} (v : vec A n) (i : fin n) :
drop i v = v !!! i :: drop (S i) v.
Proof. induction i; inv_vec v; simpl; intros; [done | by rewrite IHi]. Qed.
Lemma vec_to_list_take_drop_lookup {A n} (v : vec A n) (i : fin n) :
vec_to_list v = take i v ++ v !!! i :: drop (S i) v.
Proof. rewrite <-(take_drop i v) at 1. by rewrite vec_to_list_drop_lookup. Qed.
Lemma elem_of_vlookup {A n} (v : vec A n) x :
x ∈ vec_to_list v ↔ ∃ i, v !!! i = x.
Proof.
split.
- induction v; simpl; [by rewrite elem_of_nil |].
inversion 1; subst; [by eexists 0%fin|].
destruct IHv as [i ?]; trivial. by ∃ (FS i).
- intros [i ?]; subst. induction v as [|??? IH]; inv_fin i; [by left|].
right; apply IH.
Qed.
Lemma Forall_vlookup {A} (P : A → Prop) {n} (v : vec A n) :
Forall P (vec_to_list v) ↔ ∀ i, P (v !!! i).
Proof. rewrite Forall_forall. setoid_rewrite elem_of_vlookup. naive_solver. Qed.
Lemma Forall_vlookup_1 {A} (P : A → Prop) {n} (v : vec A n) i :
Forall P (vec_to_list v) → P (v !!! i).
Proof. by rewrite Forall_vlookup. Qed.
Lemma Forall_vlookup_2 {A} (P : A → Prop) {n} (v : vec A n) :
(∀ i, P (v !!! i)) → Forall P (vec_to_list v).
Proof. by rewrite Forall_vlookup. Qed.
Lemma Exists_vlookup {A} (P : A → Prop) {n} (v : vec A n) :
Exists P (vec_to_list v) ↔ ∃ i, P (v !!! i).
Proof. rewrite Exists_exists. setoid_rewrite elem_of_vlookup. naive_solver. Qed.
Lemma Forall2_vlookup {A B} (P : A → B → Prop) {n}
(v1 : vec A n) (v2 : vec B n) :
Forall2 P (vec_to_list v1) (vec_to_list v2) ↔ ∀ i, P (v1 !!! i) (v2 !!! i).
Proof.
split.
- vec_double_ind v1 v2; [intros _ i; inv_fin i |].
intros n v1 v2 IH a b; simpl. inversion_clear 1.
intros i. inv_fin i; simpl; auto.
- vec_double_ind v1 v2; [constructor|].
intros ??? IH ?? H. constructor. apply (H 0%fin). apply IH, (λ i, H (FS i)).
Qed.
Notation vmap := Vector.map.
Lemma vlookup_map `(f : A → B) {n} (v : vec A n) i :
vmap f v !!! i = f (v !!! i).
Proof. by apply Vector.nth_map. Qed.
Lemma vec_to_list_map `(f : A → B) {n} (v : vec A n) :
vec_to_list (vmap f v) = f <$> vec_to_list v.
Proof. induction v; simpl. done. by rewrite IHv. Qed.
Lemma vlookup_map `(f : A → B) {n} (v : vec A n) i :
vmap f v !!! i = f (v !!! i).
Proof. by apply Vector.nth_map. Qed.
Lemma vec_to_list_map `(f : A → B) {n} (v : vec A n) :
vec_to_list (vmap f v) = f <$> vec_to_list v.
Proof. induction v; simpl. done. by rewrite IHv. Qed.
Notation vzip_with := Vector.map2.
Lemma vlookup_zip_with `(f : A → B → C) {n} (v1 : vec A n) (v2 : vec B n) i :
vzip_with f v1 v2 !!! i = f (v1 !!! i) (v2 !!! i).
Proof. by apply Vector.nth_map2. Qed.
Lemma vec_to_list_zip_with `(f : A → B → C) {n} (v1 : vec A n) (v2 : vec B n) :
vec_to_list (vzip_with f v1 v2) =
zip_with f (vec_to_list v1) (vec_to_list v2).
Proof.
revert v2. induction v1; intros v2; inv_vec v2; intros; simpl; [done|].
by rewrite IHv1.
Qed.
Lemma vlookup_zip_with `(f : A → B → C) {n} (v1 : vec A n) (v2 : vec B n) i :
vzip_with f v1 v2 !!! i = f (v1 !!! i) (v2 !!! i).
Proof. by apply Vector.nth_map2. Qed.
Lemma vec_to_list_zip_with `(f : A → B → C) {n} (v1 : vec A n) (v2 : vec B n) :
vec_to_list (vzip_with f v1 v2) =
zip_with f (vec_to_list v1) (vec_to_list v2).
Proof.
revert v2. induction v1; intros v2; inv_vec v2; intros; simpl; [done|].
by rewrite IHv1.
Qed.
Similar to vlookup, we cannot define vinsert as an instance of the
Insert type class, as it has a dependent type.
Fixpoint vinsert {A n} (i : fin n) (x : A) : vec A n → vec A n :=
match i with
| 0%fin ⇒ vec_S_inv _ (λ _ v, x ::: v)
| FS _ i ⇒ vec_S_inv _ (λ y v, y ::: vinsert i x v)
end.
Lemma vec_to_list_insert {A n} i x (v : vec A n) :
vec_to_list (vinsert i x v) = insert (fin_to_nat i) x (vec_to_list v).
Proof. induction v; inv_fin i. done. simpl. intros. by rewrite IHv. Qed.
Lemma vlookup_insert {A n} i x (v : vec A n) : vinsert i x v !!! i = x.
Proof. by induction i; inv_vec v. Qed.
Lemma vlookup_insert_ne {A n} i j x (v : vec A n) :
i ≠ j → vinsert i x v !!! j = v !!! j.
Proof.
induction i; inv_fin j; inv_vec v; simpl; try done.
intros. apply IHi. congruence.
Qed.
Lemma vlookup_insert_self {A n} i (v : vec A n) : vinsert i (v !!! i) v = v.
Proof. by induction v; inv_fin i; intros; f_equal/=. Qed.
match i with
| 0%fin ⇒ vec_S_inv _ (λ _ v, x ::: v)
| FS _ i ⇒ vec_S_inv _ (λ y v, y ::: vinsert i x v)
end.
Lemma vec_to_list_insert {A n} i x (v : vec A n) :
vec_to_list (vinsert i x v) = insert (fin_to_nat i) x (vec_to_list v).
Proof. induction v; inv_fin i. done. simpl. intros. by rewrite IHv. Qed.
Lemma vlookup_insert {A n} i x (v : vec A n) : vinsert i x v !!! i = x.
Proof. by induction i; inv_vec v. Qed.
Lemma vlookup_insert_ne {A n} i j x (v : vec A n) :
i ≠ j → vinsert i x v !!! j = v !!! j.
Proof.
induction i; inv_fin j; inv_vec v; simpl; try done.
intros. apply IHi. congruence.
Qed.
Lemma vlookup_insert_self {A n} i (v : vec A n) : vinsert i (v !!! i) v = v.
Proof. by induction v; inv_fin i; intros; f_equal/=. Qed.