# Library Coq.ssr.ssreflect

This file is the Gallina part of the ssreflect plugin implementation.
Files that use the ssreflect plugin should always Require ssreflect and
either Import ssreflect or Import ssreflect.SsrSyntax.
Part of the contents of this file is technical and will only interest
advanced developers; in addition the following are defined:
[the str of v by f] == the Canonical s : str such that f s = v.
[the str of v] == the Canonical s : str that coerces to v.
argumentType c == the T such that c : forall x : T, P x.
returnType c == the R such that c : T -> R.
{type of c for s} == P s where c : forall x : T, P x.
nonPropType == an interface for non-Prop Types: a nonPropType coerces
to a Type, and only types that do
Additionally we provide default intro pattern ltac views:
More information about these definitions and their use can be found in the
ssreflect manual, and in specific comments below.

*not*have sort Prop are canonical nonPropType instances. This is useful for applied views (see mid-file comment). notProp T == the nonPropType instance for type T. phantom T v == singleton type with inhabitant Phantom T v. phant T == singleton type with inhabitant Phant v. =^~ r == the converse of rewriting rule r (e.g., in a rewrite multirule). unkeyed t == t, but treated as an unkeyed matching pattern by the ssreflect matching algorithm. nosimpl t == t, but on the right-hand side of Definition C := nosimpl disables expansion of C by /=. locked t == t, but locked t is not convertible to t. locked_with k t == t, but not convertible to t or locked_with k' t unless k = k' (with k : unit). Coq type-checking will be much more efficient if locked_with with a bespoke k is used for sealed definitions. unlockable v == interface for sealed constant definitions of v. Unlockable def == the unlockable that registers def : C = v. [unlockable of C] == a clone for C of the canonical unlockable for the definition of C (e.g., if it uses locked_with). [unlockable fun C] == [unlockable of C] with the expansion forced to be an explicit lambda expression.- > The usage pattern for ADT operations is: Definition foo_def x1 .. xn := big_foo_expression. Fact foo_key : unit. Proof. by [ ]. Qed. Definition foo := locked_with foo_key foo_def. Canonical foo_unlockable := [unlockable fun foo]. This minimizes the comparison overhead for foo, while still allowing rewrite unlock to expose big_foo_expression.

- top of the stack actions: => /apply := => hyp {}/hyp => /swap := => x y; move: y x (also swap and perserves let bindings) => /dup := => x; have copy := x; move: copy x (also copies and preserves let bindings)

Declare Ssr keywords: 'is' 'of' '//' '/=' and '//='. We also declare the
parsing level 8, as a workaround for a notation grammar factoring problem.
Arguments of application-style notations (at level 10) should be declared
at level 8 rather than 9 or the camlp5 grammar will not factor properly.

Reserved Notation "(* x 'is' y 'of' z 'isn't' // /= //= *)" (at level 8).

Reserved Notation "(* 69 *)" (at level 69).

Non ambiguous keyword to check if the SsrSyntax module is imported

Reserved Notation "(* Use to test if 'SsrSyntax_is_Imported' *)" (at level 8).

Reserved Notation "<hidden n >" (at level 0, n at level 0,

format "<hidden n >").

Reserved Notation "T (* n *)" (at level 200, format "T (* n *)").

End SsrSyntax.

Export SsrMatchingSyntax.

Export SsrSyntax.

Reserved Notation "<hidden n >" (at level 0, n at level 0,

format "<hidden n >").

Reserved Notation "T (* n *)" (at level 200, format "T (* n *)").

End SsrSyntax.

Export SsrMatchingSyntax.

Export SsrSyntax.

Save primitive notation that will be overloaded.

Reserve notation that introduced in this file.

Reserved Notation "'if' c 'then' vT 'else' vF" (at level 200,

c, vT, vF at level 200).

Reserved Notation "'if' c 'return' R 'then' vT 'else' vF" (at level 200,

c, R, vT, vF at level 200).

Reserved Notation "'if' c 'as' x 'return' R 'then' vT 'else' vF" (at level 200,

c, R, vT, vF at level 200, x name).

Reserved Notation "x : T" (at level 100, right associativity,

format "'[hv' x '/ ' : T ']'").

Reserved Notation "T : 'Type'" (at level 100, format "T : 'Type'").

Reserved Notation "P : 'Prop'" (at level 100, format "P : 'Prop'").

Reserved Notation "[ 'the' sT 'of' v 'by' f ]" (at level 0,

format "[ 'the' sT 'of' v 'by' f ]").

Reserved Notation "[ 'the' sT 'of' v ]" (at level 0,

format "[ 'the' sT 'of' v ]").

Reserved Notation "{ 'type' 'of' c 'for' s }" (at level 0,

format "{ 'type' 'of' c 'for' s }").

Reserved Notation "=^~ r" (at level 100, format "=^~ r").

Reserved Notation "[ 'unlockable' 'of' C ]" (at level 0,

format "[ 'unlockable' 'of' C ]").

Reserved Notation "[ 'unlockable' 'fun' C ]" (at level 0,

format "[ 'unlockable' 'fun' C ]").

c, vT, vF at level 200).

Reserved Notation "'if' c 'return' R 'then' vT 'else' vF" (at level 200,

c, R, vT, vF at level 200).

Reserved Notation "'if' c 'as' x 'return' R 'then' vT 'else' vF" (at level 200,

c, R, vT, vF at level 200, x name).

Reserved Notation "x : T" (at level 100, right associativity,

format "'[hv' x '/ ' : T ']'").

Reserved Notation "T : 'Type'" (at level 100, format "T : 'Type'").

Reserved Notation "P : 'Prop'" (at level 100, format "P : 'Prop'").

Reserved Notation "[ 'the' sT 'of' v 'by' f ]" (at level 0,

format "[ 'the' sT 'of' v 'by' f ]").

Reserved Notation "[ 'the' sT 'of' v ]" (at level 0,

format "[ 'the' sT 'of' v ]").

Reserved Notation "{ 'type' 'of' c 'for' s }" (at level 0,

format "{ 'type' 'of' c 'for' s }").

Reserved Notation "=^~ r" (at level 100, format "=^~ r").

Reserved Notation "[ 'unlockable' 'of' C ]" (at level 0,

format "[ 'unlockable' 'of' C ]").

Reserved Notation "[ 'unlockable' 'fun' C ]" (at level 0,

format "[ 'unlockable' 'fun' C ]").

To define notations for tactic in intro patterns.
When "=> /t" is parsed, "t:

Delimit Scope ssripat_scope with ssripat.

Make the general "if" into a notation, so that we can override it below.
The notations are "only parsing" because the Coq decompiler will not
recognize the expansion of the boolean if; using the default printer
avoids a spurious trailing %GEN_IF.

Delimit Scope general_if_scope with GEN_IF.

Notation "'if' c 'then' vT 'else' vF" :=

(CoqGenericIf c vT vF) (only parsing) : general_if_scope.

Notation "'if' c 'return' R 'then' vT 'else' vF" :=

(CoqGenericDependentIf c c R vT vF) (only parsing) : general_if_scope.

Notation "'if' c 'as' x 'return' R 'then' vT 'else' vF" :=

(CoqGenericDependentIf c x R vT vF) (only parsing) : general_if_scope.

Force boolean interpretation of simple if expressions.

Delimit Scope boolean_if_scope with BOOL_IF.

Notation "'if' c 'return' R 'then' vT 'else' vF" :=

(if c is true as c in bool return R then vT else vF) : boolean_if_scope.

Notation "'if' c 'then' vT 'else' vF" :=

(if c%bool is true as _ in bool return _ then vT else vF) : boolean_if_scope.

Notation "'if' c 'as' x 'return' R 'then' vT 'else' vF" :=

(if c%bool is true as x in bool return R then vT else vF) : boolean_if_scope.

Open Scope boolean_if_scope.

To allow a wider variety of notations without reserving a large number of
of identifiers, the ssreflect library systematically uses "forms" to
enclose complex mixfix syntax. A "form" is simply a mixfix expression
enclosed in square brackets and introduced by a keyword:
[keyword ... ]
Because the keyword follows a bracket it does not need to be reserved.
Non-ssreflect libraries that do not respect the form syntax (e.g., the Coq
Lists library) should be loaded before ssreflect so that their notations
do not mask all ssreflect forms.

Delimit Scope form_scope with FORM.

Open Scope form_scope.

Open Scope form_scope.

Allow overloading of the cast (x : T) syntax, put whitespace around the
":" symbol to avoid lexical clashes (and for consistency with the parsing
precedence of the notation, which binds less tightly than application),
and put printing boxes that print the type of a long definition on a
separate line rather than force-fit it at the right margin.

Allow the casual use of notations like nat * nat for explicit Type
declarations. Note that (nat * nat : Type) is NOT equivalent to
(nat * nat)%type, whose inferred type is legacy type "Set".

Allow similarly Prop annotation for, e.g., rewrite multirules.

Constants for abstract: and [: name ] intro pattern

Definition abstract_lock := unit.

Definition abstract_key := tt.

Definition abstract (statement : Type) (id : nat) (lock : abstract_lock) :=

let: tt := lock in statement.

Notation <hidden n >" := (abstract _ n _) : ssr_scope.

Notation "T (* n *)" := (abstract T n abstract_key) : ssr_scope.

Open Scope ssr_scope.

Definition abstract_key := tt.

Definition abstract (statement : Type) (id : nat) (lock : abstract_lock) :=

let: tt := lock in statement.

Notation <hidden n >" := (abstract _ n _) : ssr_scope.

Notation "T (* n *)" := (abstract T n abstract_key) : ssr_scope.

Open Scope ssr_scope.

Constants for tactic-views

Syntax for referring to canonical structures:
[the struct_type of proj_val by proj_fun]
This form denotes the Canonical instance s of the Structure type
struct_type whose proj_fun projection is proj_val, i.e., such that
proj_fun s = proj_val.
Typically proj_fun will be A record field accessors of struct_type, but
this need not be the case; it can be, for instance, a field of a record
type to which struct_type coerces; proj_val will likewise be coerced to
the return type of proj_fun. In all but the simplest cases, proj_fun
should be eta-expanded to allow for the insertion of implicit arguments.
In the common case where proj_fun itself is a coercion, the "by" part
can be omitted entirely; in this case it is inferred by casting s to the
inferred type of proj_val. Obviously the latter can be fixed by using an
explicit cast on proj_val, and it is highly recommended to do so when the
return type intended for proj_fun is "Type", as the type inferred for
proj_val may vary because of sort polymorphism (it could be Set or Prop).
Note when using the [the _ of _ ] form to generate a substructure from a
telescopes-style canonical hierarchy (implementing inheritance with
coercions), one should always project or coerce the value to the BASE
structure, because Coq will only find a Canonical derived structure for
the Canonical base structure -- not for a base structure that is specific
to proj_value.

Module TheCanonical.

#[universes(template)]

Variant put vT sT (v1 v2 : vT) (s : sT) := Put.

Definition get vT sT v s (p : @put vT sT v v s) := let: Put _ _ _ := p in s.

Definition get_by vT sT of sT -> vT := @get vT sT.

End TheCanonical.

Import TheCanonical.

Notation "[ 'the' sT 'of' v 'by' f ]" :=

(@get_by _ sT f _ _ ((fun v' (s : sT) => Put v' (f s) s) v _))

(only parsing) : form_scope.

Notation "[ 'the' sT 'of' v ]" := (get ((fun s : sT => Put v s s) _))

(only parsing) : form_scope.

The following are "format only" versions of the above notations.
We need to do this to prevent the formatter from being be thrown off by
application collapsing, coercion insertion and beta reduction in the right
hand side of the notations above.

Notation "[ 'the' sT 'of' v 'by' f ]" := (@get_by _ sT f v _ _)

(only printing) : form_scope.

Notation "[ 'the' sT 'of' v ]" := (@get _ sT v _ _)

(only printing) : form_scope.

We would like to recognize
Notation " [ 'the' sT 'of' v : 'Type' ]" := (@get Type sT v _ )
(at level 0, format " [ 'the' sT 'of' v : 'Type' ]") : form_scope.
Helper notation for canonical structure inheritance support.
This is a workaround for the poor interaction between delta reduction and
canonical projections in Coq's unification algorithm, by which transparent
definitions hide canonical instances, i.e., in
Canonical a_type_struct := @Struct a_type ...
Definition my_type := a_type.
my_type doesn't effectively inherit the struct structure from a_type. Our
solution is to redeclare the instance as follows
Canonical my_type_struct := Eval hnf in [struct of my_type].
The special notation [str of _ ] must be defined for each Strucure "str"
with constructor "Str", typically as follows
Definition clone_str s :=
let: Str _ x y ... z := s return {type of Str for s} -> str in
fun k => k _ x y ... z.
Notation " [ 'str' 'of' T 'for' s ]" := (@clone_str s (@Str T))
(at level 0, format " [ 'str' 'of' T 'for' s ]") : form_scope.
Notation " [ 'str' 'of' T ]" := (repack_str (fun x => @Str T x))
(at level 0, format " [ 'str' 'of' T ]") : form_scope.
The notation for the match return predicate is defined below; the eta
expansion in the second form serves both to distinguish it from the first
and to avoid the delta reduction problem.
There are several variations on the notation and the definition of the
the "clone" function, for telescopes, mixin classes, and join (multiple
inheritance) classes. We describe a different idiom for clones in ssrfun;
it uses phantom types (see below) and static unification; see fintype and
ssralg for examples.

Definition argumentType T P & forall x : T, P x := T.

Definition dependentReturnType T P & forall x : T, P x := P.

Definition returnType aT rT & aT -> rT := rT.

Notation "{ 'type' 'of' c 'for' s }" := (dependentReturnType c s) : type_scope.

A generic "phantom" type (actually, a unit type with a phantom parameter).
This type can be used for type definitions that require some Structure
on one of their parameters, to allow Coq to infer said structure so it
does not have to be supplied explicitly or via the " [the _ of _ ]" notation
(the latter interacts poorly with other Notation).
The definition of a (co)inductive type with a parameter p : p_type, that
needs to use the operations of a structure
Structure p_str : Type := p_Str {p_repr :> p_type; p_op : p_repr -> ...}
should be given as
Inductive indt_type (p : p_str) := Indt ... .
Definition indt_of (p : p_str) & phantom p_type p := indt_type p.
Notation "{ 'indt' p }" := (indt_of (Phantom p)).
Definition indt p x y ... z : {indt p} := @Indt p x y ... z.
Notation " [ 'indt' x y ... z ]" := (indt x y ... z).
That is, the concrete type and its constructor should be shadowed by
definitions that use a phantom argument to infer and display the true
value of p (in practice, the "indt" constructor often performs additional
functions, like "locking" the representation -- see below).
We also define a simpler version ("phant" / "Phant") of phantom for the
common case where p_type is Type.

#[universes(template)]

Variant phantom T (p : T) := Phantom.

#[universes(template)]

Variant phant (p : Type) := Phant.

Internal tagging used by the implementation of the ssreflect elim.

The ssreflect idiom for a non-keyed pattern:

- unkeyed t will match any subterm that unifies with t, regardless of whether it displays the same head symbol as t.
- unkeyed t a b will match any application of a term f unifying with t, to two arguments unifying with with a and b, respectively, regardless of apparent head symbols.
- unkeyed x where x is a variable will match any subterm with the same type as x (when x would raise the 'indeterminate pattern' error).

Ssreflect converse rewrite rule rule idiom.

Definition ssr_converse R (r : R) := (Logic.I, r).

Notation "=^~ r" := (ssr_converse r) : form_scope.

Notation "=^~ r" := (ssr_converse r) : form_scope.

Term tagging (user-level).
The ssreflect library uses four strengths of term tagging to restrict
convertibility during type checking:
nosimpl t simplifies to t EXCEPT in a definition; more precisely, given
Definition foo := nosimpl bar, foo (or foo t') will NOT be expanded by
the /= and //= switches unless it is in a forcing context (e.g., in
match foo t' with ... end, foo t' will be reduced if this allows the
match to be reduced). Note that nosimpl bar is simply notation for a
a term that beta-iota reduces to bar; hence rewrite /foo will replace
foo by bar, and rewrite -/foo will replace bar by foo.
CAVEAT: nosimpl should not be used inside a Section, because the end of
section "cooking" removes the iota redex.
locked t is provably equal to t, but is not convertible to t; 'locked'
provides support for selective rewriting, via the lock t : t = locked t
Lemma, and the ssreflect unlock tactic.
locked_with k t is equal but not convertible to t, much like locked t,
but supports explicit tagging with a value k : unit. This is used to
mitigate a flaw in the term comparison heuristic of the Coq kernel,
which treats all terms of the form locked t as equal and compares their
arguments recursively, leading to an exponential blowup of comparison.
For this reason locked_with should be used rather than locked when
defining ADT operations. The unlock tactic does not support locked_with
but the unlock rewrite rule does, via the unlockable interface.
we also use Module Type ascription to create truly opaque constants,
because simple expansion of constants to reveal an unreducible term
doubles the time complexity of a negative comparison. Such opaque
constants can be expanded generically with the unlock rewrite rule.
See the definition of card and subset in fintype for examples of this.

Notation nosimpl t := (let: tt := tt in t).

Lemma master_key : unit.

Definition locked A := let: tt := master_key in fun x : A => x.

Lemma lock A x : x = locked x :> A.

Needed for locked predicates, in particular for eqType's.

The basic closing tactic "done".

Ltac done :=

trivial; hnf; intros; solve

[ do ![solve [trivial | apply: sym_equal; trivial]

| discriminate | contradiction | split]

| case not_locked_false_eq_true; assumption

| match goal with H : ~ _ |- _ => solve [case H; trivial] end ].

trivial; hnf; intros; solve

[ do ![solve [trivial | apply: sym_equal; trivial]

| discriminate | contradiction | split]

| case not_locked_false_eq_true; assumption

| match goal with H : ~ _ |- _ => solve [case H; trivial] end ].

Quicker done tactic not including split, syntax: /0/

Ltac ssrdone0 :=

trivial; hnf; intros; solve

[ do ![solve [trivial | apply: sym_equal; trivial]

| discriminate | contradiction ]

| case not_locked_false_eq_true; assumption

| match goal with H : ~ _ |- _ => solve [case H; trivial] end ].

trivial; hnf; intros; solve

[ do ![solve [trivial | apply: sym_equal; trivial]

| discriminate | contradiction ]

| case not_locked_false_eq_true; assumption

| match goal with H : ~ _ |- _ => solve [case H; trivial] end ].

To unlock opaque constants.

#[universes(template)]

Structure unlockable T v := Unlockable {unlocked : T; _ : unlocked = v}.

Lemma unlock T x C : @unlocked T x C = x.

Notation "[ 'unlockable' 'of' C ]" :=

(@Unlockable _ _ C (unlock _)) : form_scope.

Notation "[ 'unlockable' 'fun' C ]" :=

(@Unlockable _ (fun _ => _) C (unlock _)) : form_scope.

Structure unlockable T v := Unlockable {unlocked : T; _ : unlocked = v}.

Lemma unlock T x C : @unlocked T x C = x.

Notation "[ 'unlockable' 'of' C ]" :=

(@Unlockable _ _ C (unlock _)) : form_scope.

Notation "[ 'unlockable' 'fun' C ]" :=

(@Unlockable _ (fun _ => _) C (unlock _)) : form_scope.

Generic keyed constant locking.
The argument order ensures that k is always compared before T.

This can be used as a cheap alternative to cloning the unlockable instance
below, but with caution as unkeyed matching can be expensive.

Intensionaly, this instance will not apply to locked u.

More accurate variant of unlock, and safer alternative to locked_withE.

The internal lemmas for the have tactics.

Definition ssr_have Plemma Pgoal (step : Plemma) rest : Pgoal := rest step.

Definition ssr_have_let Pgoal Plemma step

(rest : let x : Plemma := step in Pgoal) : Pgoal := rest.

Definition ssr_suff Plemma Pgoal step (rest : Plemma) : Pgoal := step rest.

Definition ssr_wlog := ssr_suff.

Internal N-ary congruence lemmas for the congr tactic.

Fixpoint nary_congruence_statement (n : nat)

: (forall B, (B -> B -> Prop) -> Prop) -> Prop :=

match n with

| O => fun k => forall B, k B (fun x1 x2 : B => x1 = x2)

| S n' =>

let k' A B e (f1 f2 : A -> B) :=

forall x1 x2, x1 = x2 -> (e (f1 x1) (f2 x2) : Prop) in

fun k => forall A, nary_congruence_statement n' (fun B e => k _ (k' A B e))

end.

Lemma nary_congruence n (k := fun B e => forall y : B, (e y y : Prop)) :

nary_congruence_statement n k.

Lemma ssr_congr_arrow Plemma Pgoal : Plemma = Pgoal -> Plemma -> Pgoal.

View lemmas that don't use reflection.

Section ApplyIff.

Variables P Q : Prop.

Hypothesis eqPQ : P <-> Q.

Lemma iffLR : P -> Q.

Lemma iffRL : Q -> P.

Lemma iffLRn : ~P -> ~Q.

Lemma iffRLn : ~Q -> ~P.

End ApplyIff.

To focus non-ssreflect tactics on a subterm, eg vm_compute.
Usage:
elim/abstract_context: (pattern) => G defG.
vm_compute; rewrite {}defG {G}.
Note that vm_cast are not stored in the proof term
for reductions occurring in the context, hence
set here := pattern; vm_compute in (value of here)
blows up at Qed time.

Lemma abstract_context T (P : T -> Type) x :

(forall Q, Q = P -> Q x) -> P x.

Require Export ssrunder.

#[global]

Hint Extern 0 (@Under_rel.Over_rel _ _ _ _) =>

solve [ apply: Under_rel.over_rel_done ] : core.

#[global]

Hint Resolve Under_rel.over_rel_done : core.

(forall Q, Q = P -> Q x) -> P x.

Require Export ssrunder.

#[global]

Hint Extern 0 (@Under_rel.Over_rel _ _ _ _) =>

solve [ apply: Under_rel.over_rel_done ] : core.

#[global]

Hint Resolve Under_rel.over_rel_done : core.

Closing rewrite rule

Closing tactic

Convenience rewrite rule to unprotect evars, e.g., to instantiate
them in another way than with reflexivity.

An interface for non-Prop types; used to avoid improper instantiation
of polymorphic lemmas with on-demand implicits when they are used as views.
For example: Some_inj {T} : forall x y : T, Some x = Some y -> x = y.
Using move/Some_inj on a goal of the form Some n = Some 0 will fail:
SSReflect will interpret the view as @Some_inj ?T

*top_assumption*since this is the well-typed application of the view with the minimal number of inserted evars (taking ?T := Some n = Some 0), and then will later complain that it cannot erase*top_assumption*after having abstracted the viewed assumption. Making x and y maximal implicits would avoid this and force the intended @Some_inj nat x y*top_assumption*interpretation, but is undesirable as it makes it harder to use Some_inj with the many SSReflect and MathComp lemmas that have an injectivity premise. Specifying {T : nonPropType} solves this more elegantly, as then (?T : Type) no longer unifies with (Some n = Some 0), which has sort Prop.
Implementation notes:
We rely on three interface Structures:

- test_of r, the middle structure, performs the actual check: it has two canonical instances whose 'condition' projection are maybeProj (?P : Prop) and tt, and which set r := true and r := false, respectively. Unifying condition (?t : test_of ?r) with maybeProj T will thus set ?r to true if T is in Prop as the test_Prop T instance will apply, and otherwise simplify maybeProp T to tt and use the test_negative instance and set ?r to false.
- call_of c r sets up a call to test_of on condition c with expected result r. It has a default instance for its 'callee' projection to Type, which sets c := maybeProj T and r := false when unifying with a type T.
- type is a telescope on call_of c r, which checks that unifying test_of ?r1 with c indeed sets ?r1 := r; the type structure bundles the 'test' instance and its 'result' value along with its call_of c r projection. The default instance essentially provides eta-expansion for 'type'. This is only essential for the first 'result' projection to bool; using the instance for other projection merely avoids spurious delta expansions that would spoil the notProp T notation.

*committing*to it. But now (3) is inconsistent with (9a), and this makes the entire problem (1) fails. If on the othe hand T does not have sort Prop then (7a) fails and the unification resorts to delta expanding (2a), which gives (2b) @condition (result ?S) (test ?S) =~= tt which is then reduced, using the test_negative instance, to (6b) result ?S =~= false (8b) test ?S =~= test_negative Both are solved using the check default instance, as in the (2a) branch, giving (9b) ?S := @check false test_negative ?frame Then (3) and (4) are similarly soved using check, giving the final assignment (9) ?S := notProp T Observe that we*must*perform the actual test unification on the arguments of the initial canonical instance, and not on the instance itself as we do in mathcomp/matrix and mathcomp/vector, because we want the unification to fail when T has sort Prop. If both the test_of*and*the result check unifications were done as part of the structure telescope then the latter would be a sub-problem of the former, and thus failing the check would merely make the test_of unification backtrack and delta-expand and we would not get failure.Structure call_of (condition : unit) (result : bool) := Call {callee : Type}.

Definition maybeProp (T : Type) := tt.

Definition call T := Call (maybeProp T) false T.

Structure test_of (result : bool) := Test {condition :> unit}.

Definition test_Prop (P : Prop) := Test true (maybeProp P).

Definition test_negative := Test false tt.

Structure type :=

Check {result : bool; test : test_of result; frame : call_of test result}.

Definition check result test frame := @Check result test frame.

Module Exports.

Canonical call.

Canonical test_Prop.

Canonical test_negative.

Canonical check.

Notation nonPropType := type.

Coercion callee : call_of >-> Sortclass.

Coercion frame : type >-> call_of.

Notation notProp T := (@check false test_negative (call T)).

End Exports.

End NonPropType.

Export NonPropType.Exports.

Module Export ipat.

Notation "'[' 'apply' ']'" := (ltac:(let f := fresh "_top_" in move=> f {}/f))

(at level 0, only parsing) : ssripat_scope.

Notation "'[' 'swap' ']'" := (ltac:(move;

let x := lazymatch goal with

| |- forall (x : _), _ => fresh x | |- let x := _ in _ => fresh x | _ => fresh "_top_"

end in intro x; move;

let y := lazymatch goal with

| |- forall (y : _), _ => fresh y | |- let y := _ in _ => fresh y | _ => fresh "_top_"

end in intro y; revert x; revert y))

(at level 0, only parsing) : ssripat_scope.

Notation "'[' 'dup' ']'" := (ltac:(move;

lazymatch goal with

| |- forall (x : _), _ =>

let x := fresh x in intro x;

let copy := fresh x in have copy := x; revert x; revert copy

| |- let x := _ in _ =>

let x := fresh x in intro x;

let copy := fresh x in pose copy := x;

do [unfold x in (value of copy)]; revert x; revert copy

| |- _ =>

let x := fresh "_top_" in move=> x;

let copy := fresh "_top" in have copy := x; revert x; revert copy

end))

(at level 0, only parsing) : ssripat_scope.

End ipat.