Commit a5771292 authored by Robbert Krebbers's avatar Robbert Krebbers

Merge branch 'robbert/bupd_alt' into 'master'

Alternative definition of the basic update modality

See merge request iris/iris!211
parents f5d03e25 ebb452d3
......@@ -52,7 +52,7 @@ theories/base_logic/bi.v
theories/base_logic/derived.v
theories/base_logic/proofmode.v
theories/base_logic/base_logic.v
theories/base_logic/double_negation.v
theories/base_logic/bupd_alt.v
theories/base_logic/lib/iprop.v
theories/base_logic/lib/own.v
theories/base_logic/lib/saved_prop.v
......
From iris.base_logic Require Export base_logic.
From iris.proofmode Require Import tactics.
(** This file contains an alternative version of basic updates, that is
expression in terms of just the plain modality [■]. *)
Definition bupd_alt `{BiPlainly PROP} (P : PROP) : PROP :=
( R, (P - R) - R)%I.
(** This definition is stated for any BI with a plain modality. The above
definition is akin to the continuation monad, where one should think of [■ R]
being the final result that one wants to get out of the basic update in the end
of the day (via [bupd_alt (■ P) ⊢ ■ P]).
We show that:
1. [bupd_alt] enjoys the usual rules of the basic update modality.
2. [bupd_alt] entails any other modality that enjoys the laws of a basic update
modality (see [bupd_bupd_alt]).
3. The ordinary basic update modality [|==>] on [uPred] entails [bupd_alt]
(see [bupd_alt_bupd]). This result is proven in the model of [uPred].
The first two points are shown for any BI with a plain modality. *)
Section bupd_alt.
Context `{BiPlainly PROP}.
Implicit Types P Q R : PROP.
Notation bupd_alt := (@bupd_alt PROP _).
Global Instance bupd_alt_ne : NonExpansive bupd_alt.
Proof. solve_proper. Qed.
Global Instance bupd_alt_proper : Proper (() ==> ()) bupd_alt.
Proof. solve_proper. Qed.
Global Instance bupd_alt_mono' : Proper (() ==> ()) bupd_alt.
Proof. solve_proper. Qed.
Global Instance bupd_alt_flip_mono' : Proper (flip () ==> flip ()) bupd_alt.
Proof. solve_proper. Qed.
(** The laws of the basic update modality hold *)
Lemma bupd_alt_intro P : P bupd_alt P.
Proof. iIntros "HP" (R) "H". by iApply "H". Qed.
Lemma bupd_alt_mono P Q : (P Q) bupd_alt P bupd_alt Q.
Proof. by intros ->. Qed.
Lemma bupd_alt_trans P : bupd_alt (bupd_alt P) bupd_alt P.
Proof. iIntros "HP" (R) "H". iApply "HP". iIntros "HP". by iApply "HP". Qed.
Lemma bupd_alt_frame_r P Q : bupd_alt P Q bupd_alt (P Q).
Proof.
iIntros "[HP HQ]" (R) "H". iApply "HP". iIntros "HP". iApply ("H" with "[$]").
Qed.
Lemma bupd_alt_plainly P : bupd_alt ( P) P.
Proof. iIntros "H". iApply ("H" $! P with "[]"); auto. Qed.
(** Any modality conforming with [BiBUpdPlainly] entails the alternative
definition *)
Lemma bupd_bupd_alt `{!BiBUpd PROP, BiBUpdPlainly PROP} P : (|==> P) bupd_alt P.
Proof. iIntros "HP" (R) "H". by iMod ("H" with "HP") as "?". Qed.
(** We get the usual rule for frame preserving updates if we have an [own]
connective satisfying the following rule w.r.t. interaction with plainly. *)
Context {M : ucmraT} (own : M PROP).
Context (own_updateP_plainly : x Φ R,
x ~~>: Φ
own x ( y, ⌜Φ y - own y - R) R).
Lemma own_updateP x (Φ : M Prop) :
x ~~>: Φ own x bupd_alt ( y, ⌜Φ y own y).
Proof.
iIntros (Hup) "Hx"; iIntros (R) "H".
iApply (own_updateP_plainly with "[$Hx H]"); first done.
iIntros (y ?) "Hy". iApply "H"; auto.
Qed.
End bupd_alt.
(** The alternative definition entails the ordinary basic update *)
Lemma bupd_alt_bupd {M} (P : uPred M) : bupd_alt P |==> P.
Proof.
rewrite /bupd_alt. uPred.unseal; split=> n x Hx H k y ? Hxy.
unshelve refine (H {| uPred_holds k _ :=
x' : M, {k} (x' y) P k x' |} k y _ _ _).
- intros n1 n2 x1 x2 (z&?&?) _ ?.
eauto using cmra_validN_le, uPred_mono.
- done.
- done.
- intros k' z ?? HP. exists z. by rewrite (comm op).
Qed.
Lemma bupd_alt_bupd_iff {M} (P : uPred M) : bupd_alt P |==> P.
Proof. apply (anti_symm _). apply bupd_alt_bupd. apply bupd_bupd_alt. Qed.
(** The law about the interaction between [uPred_ownM] and plainly holds. *)
Lemma ownM_updateP {M : ucmraT} x (Φ : M Prop) (R : uPred M) :
x ~~>: Φ
uPred_ownM x ( y, ⌜Φ y - uPred_ownM y - R) R.
Proof.
uPred.unseal=> Hup; split; intros n z Hv (?&z2&?&[z1 ?]&HR); ofe_subst.
destruct (Hup n (Some (z1 z2))) as (y&?&?); simpl in *.
{ by rewrite assoc. }
refine (HR y n z1 _ _ _ n y _ _ _); auto.
- rewrite comm. by eapply cmra_validN_op_r.
- by rewrite (comm _ _ y) (comm _ z2).
- apply (reflexivity (R:=includedN _)).
Qed.
From iris.base_logic Require Import base_logic.
Set Default Proof Using "Type".
(* In this file we show that the bupd can be thought of a kind of
step-indexed double-negation when our meta-logic is classical *)
Definition uPred_nnupd {M} (P: uPred M) : uPred M :=
n, (P - ^n False) - ^n False.
Notation "|=n=> Q" := (uPred_nnupd Q)
(at level 99, Q at level 200, format "|=n=> Q") : bi_scope.
Notation "P =n=> Q" := (P |=n=> Q)
(at level 99, Q at level 200, only parsing) : stdpp_scope.
Notation "P =n=∗ Q" := (P - |=n=> Q)%I
(at level 99, Q at level 200, format "P =n=∗ Q") : bi_scope.
(* Our goal is to prove that:
(1) |=n=> has (nearly) all the properties of the |==> modality that are used in Iris
(2) If our meta-logic is classical, then |=n=> and |==> are equivalent
*)
Section bupd_nnupd.
Context {M : ucmraT}.
Implicit Types φ : Prop.
Implicit Types P Q : uPred M.
Implicit Types A : Type.
Implicit Types x : M.
Import uPred.
(* Helper lemmas about iterated later modalities *)
Lemma laterN_big n a x φ: {n} x a n (^a ⌜φ⌝ : uPred M)%I n x φ.
Proof.
induction 2 as [| ?? IHle].
- induction a; repeat (rewrite //= || uPred.unseal).
intros Hlater. apply IHa; auto using cmra_validN_S.
move:Hlater; repeat (rewrite //= || uPred.unseal).
- intros. apply IHle; auto using cmra_validN_S.
eapply uPred_mono; eauto using cmra_validN_S.
Qed.
Lemma laterN_small n a x φ: {n} x n < a (^a ⌜φ⌝ : uPred M)%I n x.
Proof.
induction 2.
- induction n as [| n IHn]; [| move: IHn];
repeat (rewrite //= || uPred.unseal).
naive_solver eauto using cmra_validN_S.
- induction n as [| n IHn]; [| move: IHle];
repeat (rewrite //= || uPred.unseal).
red; rewrite //=. intros.
eapply (uPred_mono _ _ (S n)); eauto using cmra_validN_S.
Qed.
(* It is easy to show that most of the basic properties of bupd that
are used throughout Iris hold for nnupd.
In fact, the first three properties that follow hold for any
modality of the form (- -∗ Q) -∗ Q for arbitrary Q. The situation
here is slightly different, because nnupd is of the form
∀ n, (- -∗ (Q n)) -∗ (Q n), but the proofs carry over straightforwardly.
*)
Lemma nnupd_intro P : P =n=> P.
Proof. apply forall_intro=>?. apply wand_intro_l, wand_elim_l. Qed.
Lemma nnupd_mono P Q : (P Q) (|=n=> P) =n=> Q.
Proof.
intros HPQ. apply forall_intro=>n.
apply wand_intro_l. rewrite -{1}HPQ.
rewrite /uPred_nnupd (forall_elim n).
apply wand_elim_r.
Qed.
Lemma nnupd_frame_r P R : (|=n=> P) R =n=> P R.
Proof.
apply forall_intro=>n. apply wand_intro_r.
rewrite (comm _ P) -wand_curry.
rewrite /uPred_nnupd (forall_elim n).
by rewrite -assoc wand_elim_r wand_elim_l.
Qed.
Lemma nnupd_ownM_updateP x (Φ : M Prop) :
x ~~>: Φ uPred_ownM x =n=> y, ⌜Φ y uPred_ownM y.
Proof.
intros Hbupd. split. rewrite /uPred_nnupd. repeat uPred.unseal.
intros n y ? Hown a.
red; rewrite //= => n' yf ??.
inversion Hown as (x'&Hequiv).
edestruct (Hbupd n' (Some (x' yf))) as (y'&?&?); eauto.
{ by rewrite //= assoc -(dist_le _ _ _ _ Hequiv). }
case (decide (a n')).
- intros Hle Hwand.
exfalso. eapply laterN_big; last (uPred.unseal; eapply (Hwand n' (y' x'))); eauto.
* rewrite comm -assoc. done.
* rewrite comm -assoc. done.
* exists y'. split=>//. by exists x'.
- intros; assert (n' < a). lia.
move: laterN_small. uPred.unseal.
naive_solver.
Qed.
(* However, the transitivity property seems to be much harder to
prove. This is surprising, because transitivity does hold for
modalities of the form (- -∗ Q) -∗ Q. What goes wrong when we quantify
now over n?
*)
Remark nnupd_trans P: (|=n=> |=n=> P) (|=n=> P).
Proof.
rewrite /uPred_nnupd.
apply forall_intro=>a. apply wand_intro_l.
rewrite (forall_elim a).
rewrite (nnupd_intro (P - _)).
rewrite /uPred_nnupd.
(* Oops -- the exponents of the later modality don't match up! *)
Abort.
(* Instead, we will need to prove this in the model. We start by showing that
nnupd is the limit of a the following sequence:
(- -∗ False) - ∗ False,
(- -∗ ▷ False) - ∗ ▷ False ∧ (- -∗ False) - ∗ False,
(- -∗ ▷^2 False) - ∗ ▷^2 False ∧ (- -∗ ▷ False) - ∗ ▷ False ∧ (- -∗ False) - ∗ False,
...
Then, it is easy enough to show that each of the uPreds in this sequence
is transitive. It turns out that this implies that nnupd is transitive. *)
(* The definition of the sequence above: *)
Fixpoint uPred_nnupd_k {M} k (P: uPred M) : uPred M :=
((P - ^k False) - ^k False)
match k with
O => True
| S k' => uPred_nnupd_k k' P
end.
Notation "|=n=>_ k Q" := (uPred_nnupd_k k Q)
(at level 99, k at level 9, Q at level 200, format "|=n=>_ k Q") : bi_scope.
(* One direction of the limiting process is easy -- nnupd implies nnupd_k for each k *)
Lemma nnupd_trunc1 k P: (|=n=> P) |=n=>_k P.
Proof.
induction k.
- rewrite /uPred_nnupd_k /uPred_nnupd.
rewrite (forall_elim 0) //= right_id //.
- simpl. apply and_intro; auto.
rewrite /uPred_nnupd.
rewrite (forall_elim (S k)) //=.
Qed.
Lemma nnupd_k_elim n k P: n k ((|=n=>_k P) (P - (^n False)) (^n False))%I.
Proof.
induction k.
- inversion 1; subst; rewrite //= ?right_id. apply wand_elim_l.
- inversion 1; subst; rewrite //= ?right_id.
* rewrite and_elim_l. apply wand_elim_l.
* rewrite and_elim_r IHk //.
Qed.
Lemma nnupd_k_unfold k P:
(|=n=>_(S k) P) ((P - (^(S k) False)) - (^(S k) False)) (|=n=>_k P).
Proof. done. Qed.
Lemma nnupd_k_unfold' k P n x:
(|=n=>_(S k) P)%I n x (((P - (^(S k) False)) - (^(S k) False)) (|=n=>_k P))%I n x.
Proof. done. Qed.
Lemma nnupd_k_weaken k P: (|=n=>_(S k) P) |=n=>_k P.
Proof. by rewrite nnupd_k_unfold and_elim_r. Qed.
(* Now we are ready to show nnupd is the limit -- ie, for each k, it is within distance k
of the kth term of the sequence *)
Lemma nnupd_nnupd_k_dist k P: (|=n=> P)%I {k} (|=n=>_k P)%I.
split; intros n' x Hle Hx. split.
- by apply (nnupd_trunc1 k).
- revert n' x Hle Hx; induction k; intros n' x Hle Hx;
rewrite ?nnupd_k_unfold' /uPred_nnupd.
* rewrite //=. unseal.
inversion Hle; subst.
intros (HnnP&_) n k' x' ?? HPF.
case (decide (k' < n)).
** move: laterN_small; uPred.unseal; naive_solver.
** intros. exfalso. eapply HnnP; eauto.
assert (n k'). lia.
intros n'' x'' ???.
specialize (HPF n'' x''). exfalso.
eapply laterN_big; last (unseal; eauto).
eauto. lia.
* inversion Hle; simpl; subst.
** unseal. intros (HnnP&HnnP_IH) n k' x' ?? HPF.
case (decide (k' < n)).
*** move: laterN_small; uPred.unseal; naive_solver.
*** intros. exfalso. assert (n k'). lia.
assert (n = S k n < S k) as [->|] by lia.
**** eapply laterN_big; eauto; unseal.
eapply HnnP; eauto. move: HPF; by unseal.
**** move:nnupd_k_elim. unseal. intros Hnnupdk.
eapply laterN_big; eauto. unseal.
eapply (Hnnupdk n k); first lia; eauto.
exists x, x'. split_and!; eauto. eapply uPred_mono; eauto.
** intros HP. eapply IHk; auto.
move:HP. unseal. intros (?&?); naive_solver.
Qed.
(* nnupd_k has a number of structural properties, including transitivity *)
Lemma nnupd_k_intro k P: P (|=n=>_k P).
Proof.
induction k; rewrite //= ?right_id.
- apply wand_intro_l. apply wand_elim_l.
- apply and_intro; auto.
apply wand_intro_l. apply wand_elim_l.
Qed.
Lemma nnupd_k_mono k P Q: (P Q) (|=n=>_k P) (|=n=>_k Q).
Proof.
induction k; rewrite //= ?right_id=>HPQ.
- do 2 (apply wand_mono; auto).
- apply and_mono; auto; do 2 (apply wand_mono; auto).
Qed.
Instance nnupd_k_mono' k: Proper (() ==> ()) (@uPred_nnupd_k M k).
Proof. by intros P P' HP; apply nnupd_k_mono. Qed.
Instance nnupd_k_ne k : NonExpansive (@uPred_nnupd_k M k).
Proof. intros n. induction k; rewrite //= ?right_id=>P P' HP; by rewrite HP. Qed.
Lemma nnupd_k_proper k P Q: (P Q) (|=n=>_k P) (|=n=>_k Q).
Proof. intros HP; apply (anti_symm ()); eapply nnupd_k_mono; by rewrite HP. Qed.
Instance nnupd_k_proper' k: Proper (() ==> ()) (@uPred_nnupd_k M k).
Proof. by intros P P' HP; apply nnupd_k_proper. Qed.
Lemma nnupd_k_trans k P: (|=n=>_k |=n=>_k P) (|=n=>_k P).
Proof.
revert P.
induction k; intros P.
- rewrite //= ?right_id. apply wand_intro_l.
rewrite {1}(nnupd_k_intro 0 (P - False)%I) //= ?right_id. apply wand_elim_r.
- rewrite {2}(nnupd_k_unfold k P).
apply and_intro.
* rewrite (nnupd_k_unfold k P). rewrite and_elim_l.
rewrite nnupd_k_unfold. rewrite and_elim_l.
apply wand_intro_l.
rewrite {1}(nnupd_k_intro (S k) (P - ^(S k) (False)%I)).
rewrite nnupd_k_unfold and_elim_l. apply wand_elim_r.
* do 2 rewrite nnupd_k_weaken //.
Qed.
Lemma nnupd_trans P : (|=n=> |=n=> P) =n=> P.
Proof.
split=> n x ? Hnn.
eapply nnupd_nnupd_k_dist in Hnn; eauto.
eapply (nnupd_k_ne (n) n ((|=n=>_(n) P)%I)) in Hnn; eauto;
[| symmetry; eapply nnupd_nnupd_k_dist].
eapply nnupd_nnupd_k_dist; eauto.
by apply nnupd_k_trans.
Qed.
(* Now that we have shown nnupd has all of the desired properties of
bupd, we go further and show it is in fact equivalent to bupd! The
direction from bupd to nnupd is similar to the proof of
nnupd_ownM_updateP *)
Lemma bupd_nnupd P: (|==> P) |=n=> P.
Proof.
split. rewrite /uPred_nnupd. repeat uPred.unseal. intros n x ? Hbupd a.
red; rewrite //= => n' yf ??.
edestruct Hbupd as (x'&?&?); eauto.
case (decide (a n')).
- intros Hle Hwand.
exfalso. eapply laterN_big; last (uPred.unseal; eapply (Hwand n' x')); eauto.
* rewrite comm. done.
* rewrite comm. done.
- intros; assert (n' < a). lia.
move: laterN_small. uPred.unseal.
naive_solver.
Qed.
(* However, the other direction seems to need a classical axiom: *)
Section classical.
Context (not_all_not_ex: (P : M Prop), ¬ ( n : M, ¬ P n) n : M, P n).
Lemma nnupd_bupd P: (|=n=> P) (|==> P).
Proof using Type*.
rewrite /uPred_nnupd.
split. uPred.unseal; red; rewrite //=.
intros n x ? Hforall k yf Hle ?.
apply not_all_not_ex.
intros Hfal.
specialize (Hforall k k).
eapply laterN_big; last (uPred.unseal; red; rewrite //=; eapply Hforall);
eauto.
red; rewrite //= => n' x' ???.
case (decide (n' = k)); intros.
- subst. exfalso. eapply Hfal. rewrite (comm op); eauto.
- assert (n' < k). lia.
move: laterN_small. uPred.unseal. naive_solver.
Qed.
End classical.
(* We might wonder whether we can prove an adequacy lemma for nnupd. We could combine
the adequacy lemma for bupd with the previous result to get adquacy for nnupd, but
this would rely on the classical axiom we needed to prove the equivalence! Can
we establish adequacy without axioms? Unfortunately not, because adequacy for
nnupd would imply double negation elimination, which is classical: *)
Lemma nnupd_dne φ: (|=n=> ¬¬ φ φ⌝: uPred M)%I.
Proof.
rewrite /uPred_nnupd. apply forall_intro=>n.
apply wand_intro_l. rewrite ?right_id.
assert ( φ, ¬¬¬¬φ ¬¬φ) by naive_solver.
assert (Hdne: ¬¬ (¬¬φ φ)) by naive_solver.
split. unseal. intros n' ?? Hupd.
case (decide (n' < n)).
- intros. move: laterN_small. unseal. naive_solver.
- intros. assert (n n'). lia.
exfalso. specialize (Hupd n' ε).
eapply Hdne. intros Hfal.
eapply laterN_big; eauto.
unseal. rewrite right_id in Hupd *; naive_solver.
Qed.
(* Nevertheless, we can prove a weaker form of adequacy (which is equvialent to adequacy
under classical axioms) directly without passing through the proofs for bupd: *)
Lemma adequacy_helper1 P n k x:
{S n + k} x ¬¬ (Nat.iter (S n) (λ P, |=n=> P)%I P (S n + k) x)
¬¬ ( x', {n + k} (x') Nat.iter n (λ P, |=n=> P)%I P (n + k) (x')).
Proof.
revert k P x. induction n.
- rewrite /uPred_nnupd. unseal=> k P x Hx Hf1 Hf2.
eapply Hf1. intros Hf3.
eapply (laterN_big (S k) (S k)); eauto.
specialize (Hf3 (S k) (S k) ε). rewrite right_id in Hf3 *. unseal.
intros Hf3. eapply Hf3; eauto.
intros ??? Hx'. rewrite left_id in Hx' *=> Hx'.
assert (n' < S k n' = S k) as [|] by lia.
* intros. move:(laterN_small n' (S k) x' False). rewrite //=. unseal. intros Hsmall.
eapply Hsmall; eauto.
* subst. intros. exfalso. eapply Hf2. exists x'. split; eauto using cmra_validN_S.
- intros k P x Hx. rewrite ?Nat_iter_S_r.
replace (S (S n) + k) with (S n + (S k)) by lia.
replace (S n + k) with (n + (S k)) by lia.
intros. eapply IHn. replace (S n + S k) with (S (S n) + k) by lia. eauto.
rewrite ?Nat_iter_S_r. eauto.
Qed.
Lemma adequacy_helper2 P n k x:
{S n + k} x ¬¬ (Nat.iter (S n) (λ P, |=n=> P)%I P (S n + k) x)
¬¬ ( x', {k} (x') Nat.iter 0 (λ P, |=n=> P)%I P k (x')).
Proof.
revert x. induction n.
- specialize (adequacy_helper1 P 0). rewrite //=. naive_solver.
- intros ?? Hfal%adequacy_helper1; eauto using cmra_validN_S.
intros Hfal'. eapply Hfal. intros (x''&?&?).
eapply IHn; eauto.
Qed.
Lemma adequacy φ n : Nat.iter n (λ P, |=n=> P)%I ⌜φ⌝%I ¬¬ φ.
Proof.
cut ( x, {S n} x Nat.iter n (λ P, |=n=> P)%I ⌜φ⌝%I (S n) x ¬¬φ).
{ intros help H. eapply (help ); eauto using ucmra_unit_validN.
eapply H; eauto using ucmra_unit_validN. by unseal. }
destruct n.
- rewrite //=; unseal; auto.
- intros ??? Hfal.
eapply (adequacy_helper2 _ n 1); (replace (S n + 1) with (S (S n)) by lia); eauto.
unseal. intros (x'&?&Hphi). simpl in *.
eapply Hfal. auto.
Qed.
(* Open question:
Do the basic properties of the |==> modality (bupd_intro, bupd_mono, rvs_trans, rvs_frame_r,
bupd_ownM_updateP, and adequacy) uniquely characterize |==>?
*)
End bupd_nnupd.
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