Theory Hilbert_Choice
section ‹Hilbert's Epsilon-Operator and the Axiom of Choice›
theory Hilbert_Choice
imports Wellfounded
keywords "specification" :: thy_goal_defn
begin
subsection ‹Hilbert's epsilon›
axiomatization Eps :: "('a ⇒ bool) ⇒ 'a"
where someI: "P x ⟹ P (Eps P)"
syntax (epsilon)
"_Eps" :: "pttrn ⇒ bool ⇒ 'a" (‹(‹indent=3 notation=‹binder ϵ››ϵ_./ _)› [0, 10] 10)
syntax (input)
"_Eps" :: "pttrn ⇒ bool ⇒ 'a" (‹(‹indent=3 notation=‹binder @››@ _./ _)› [0, 10] 10)
syntax
"_Eps" :: "pttrn ⇒ bool ⇒ 'a" (‹(‹indent=3 notation=‹binder SOME››SOME _./ _)› [0, 10] 10)
syntax_consts "_Eps" ⇌ Eps
translations
"SOME x. P" ⇌ "CONST Eps (λx. P)"
print_translation ‹
[(\<^const_syntax>‹Eps›, fn ctxt => fn [Abs abs] =>
let val (x, t) = Syntax_Trans.atomic_abs_tr' ctxt abs
in Syntax.const \<^syntax_const>‹_Eps› $ x $ t end)]
›
definition inv_into :: "'a set ⇒ ('a ⇒ 'b) ⇒ ('b ⇒ 'a)" where
"inv_into A f = (λx. SOME y. y ∈ A ∧ f y = x)"
lemma inv_into_def2: "inv_into A f x = (SOME y. y ∈ A ∧ f y = x)"
by(simp add: inv_into_def)
abbreviation inv :: "('a ⇒ 'b) ⇒ ('b ⇒ 'a)" where
"inv ≡ inv_into UNIV"
subsection ‹Hilbert's Epsilon-operator›
lemma Eps_cong:
assumes "⋀x. P x = Q x"
shows "Eps P = Eps Q"
using ext[of P Q, OF assms] by simp
text ‹
Easier to use than ‹someI› if the witness comes from an
existential formula.
›
lemma someI_ex [elim?]: "∃x. P x ⟹ P (SOME x. P x)"
by (elim exE someI)
lemma some_eq_imp:
assumes "Eps P = a" "P b" shows "P a"
using assms someI_ex by force
text ‹
Easier to use than ‹someI› because the conclusion has only one
occurrence of \<^term>‹P›.
›
lemma someI2: "P a ⟹ (⋀x. P x ⟹ Q x) ⟹ Q (SOME x. P x)"
by (blast intro: someI)
text ‹
Easier to use than ‹someI2› if the witness comes from an
existential formula.
›
lemma someI2_ex: "∃a. P a ⟹ (⋀x. P x ⟹ Q x) ⟹ Q (SOME x. P x)"
by (blast intro: someI2)
lemma someI2_bex: "∃a∈A. P a ⟹ (⋀x. x ∈ A ∧ P x ⟹ Q x) ⟹ Q (SOME x. x ∈ A ∧ P x)"
by (blast intro: someI2)
lemma some_equality [intro]: "P a ⟹ (⋀x. P x ⟹ x = a) ⟹ (SOME x. P x) = a"
by (blast intro: someI2)
lemma some1_equality: "∃!x. P x ⟹ P a ⟹ (SOME x. P x) = a"
by blast
lemma some_eq_ex: "P (SOME x. P x) ⟷ (∃x. P x)"
by (blast intro: someI)
lemma some_in_eq: "(SOME x. x ∈ A) ∈ A ⟷ A ≠ {}"
unfolding ex_in_conv[symmetric] by (rule some_eq_ex)
lemma some_eq_trivial [simp]: "(SOME y. y = x) = x"
by (rule some_equality) (rule refl)
lemma some_sym_eq_trivial [simp]: "(SOME y. x = y) = x"
by (iprover intro: some_equality)
subsection ‹Axiom of Choice, Proved Using the Description Operator›
lemma choice: "∀x. ∃y. Q x y ⟹ ∃f. ∀x. Q x (f x)"
by (fast elim: someI)
lemma bchoice: "∀x∈S. ∃y. Q x y ⟹ ∃f. ∀x∈S. Q x (f x)"
by (fast elim: someI)
lemma choice_iff: "(∀x. ∃y. Q x y) ⟷ (∃f. ∀x. Q x (f x))"
by (fast elim: someI)
lemma choice_iff': "(∀x. P x ⟶ (∃y. Q x y)) ⟷ (∃f. ∀x. P x ⟶ Q x (f x))"
by (fast elim: someI)
lemma bchoice_iff: "(∀x∈S. ∃y. Q x y) ⟷ (∃f. ∀x∈S. Q x (f x))"
by (fast elim: someI)
lemma bchoice_iff': "(∀x∈S. P x ⟶ (∃y. Q x y)) ⟷ (∃f. ∀x∈S. P x ⟶ Q x (f x))"
by (fast elim: someI)
lemma dependent_nat_choice:
assumes 1: "∃x. P 0 x"
and 2: "⋀x n. P n x ⟹ ∃y. P (Suc n) y ∧ Q n x y"
shows "∃f. ∀n. P n (f n) ∧ Q n (f n) (f (Suc n))"
proof (intro exI allI conjI)
fix n
define f where "f = rec_nat (SOME x. P 0 x) (λn x. SOME y. P (Suc n) y ∧ Q n x y)"
then have "P 0 (f 0)" "⋀n. P n (f n) ⟹ P (Suc n) (f (Suc n)) ∧ Q n (f n) (f (Suc n))"
using someI_ex[OF 1] someI_ex[OF 2] by simp_all
then show "P n (f n)" "Q n (f n) (f (Suc n))"
by (induct n) auto
qed
lemma finite_subset_Union:
assumes "finite A" "A ⊆ ⋃ℬ"
obtains ℱ where "finite ℱ" "ℱ ⊆ ℬ" "A ⊆ ⋃ℱ"
proof -
have "∀x∈A. ∃B∈ℬ. x∈B"
using assms by blast
then obtain f where f: "⋀x. x ∈ A ⟹ f x ∈ ℬ ∧ x ∈ f x"
by (auto simp add: bchoice_iff Bex_def)
show thesis
proof
show "finite (f ` A)"
using assms by auto
qed (use f in auto)
qed
subsection ‹Getting an element of a nonempty set›
definition some_elem :: "'a set ⇒ 'a"
where "some_elem A = (SOME x. x ∈ A)"
lemma some_elem_eq [simp]: "some_elem {x} = x"
by (simp add: some_elem_def)
lemma some_elem_nonempty: "A ≠ {} ⟹ some_elem A ∈ A"
unfolding some_elem_def by (auto intro: someI)
lemma is_singleton_some_elem: "is_singleton A ⟷ A = {some_elem A}"
by (auto simp: is_singleton_def)
lemma some_elem_image_unique:
assumes "A ≠ {}"
and *: "⋀y. y ∈ A ⟹ f y = a"
shows "some_elem (f ` A) = a"
unfolding some_elem_def
proof (rule some1_equality)
from ‹A ≠ {}› obtain y where "y ∈ A" by auto
with * ‹y ∈ A› have "a ∈ f ` A" by blast
then show "a ∈ f ` A" by auto
with * show "∃!x. x ∈ f ` A"
by auto
qed
subsection ‹Function Inverse›
lemma inv_def: "inv f = (λy. SOME x. f x = y)"
by (simp add: inv_into_def)
lemma inv_into_into: "x ∈ f ` A ⟹ inv_into A f x ∈ A"
by (simp add: inv_into_def) (fast intro: someI2)
lemma inv_identity [simp]: "inv (λa. a) = (λa. a)"
by (simp add: inv_def)
lemma inv_id [simp]: "inv id = id"
by (simp add: id_def)
lemma inv_into_f_f [simp]: "inj_on f A ⟹ x ∈ A ⟹ inv_into A f (f x) = x"
by (simp add: inv_into_def inj_on_def) (blast intro: someI2)
lemma inv_f_f: "inj f ⟹ inv f (f x) = x"
by simp
lemma f_inv_into_f: "y ∈ f`A ⟹ f (inv_into A f y) = y"
by (simp add: inv_into_def) (fast intro: someI2)
lemma inv_into_f_eq: "inj_on f A ⟹ x ∈ A ⟹ f x = y ⟹ inv_into A f y = x"
by (erule subst) (fast intro: inv_into_f_f)
lemma inv_f_eq: "inj f ⟹ f x = y ⟹ inv f y = x"
by (simp add:inv_into_f_eq)
lemma inj_imp_inv_eq: "inj f ⟹ ∀x. f (g x) = x ⟹ inv f = g"
by (blast intro: inv_into_f_eq)
text ‹But is it useful?›
lemma inj_transfer:
assumes inj: "inj f"
and minor: "⋀y. y ∈ range f ⟹ P (inv f y)"
shows "P x"
proof -
have "f x ∈ range f" by auto
then have "P(inv f (f x))" by (rule minor)
then show "P x" by (simp add: inv_into_f_f [OF inj])
qed
lemma inj_iff: "inj f ⟷ inv f ∘ f = id"
by (simp add: o_def fun_eq_iff) (blast intro: inj_on_inverseI inv_into_f_f)
lemma inv_o_cancel[simp]: "inj f ⟹ inv f ∘ f = id"
by (simp add: inj_iff)
lemma o_inv_o_cancel[simp]: "inj f ⟹ g ∘ inv f ∘ f = g"
by (simp add: comp_assoc)
lemma inv_into_image_cancel[simp]: "inj_on f A ⟹ S ⊆ A ⟹ inv_into A f ` f ` S = S"
by (fastforce simp: image_def)
lemma inj_imp_surj_inv: "inj f ⟹ surj (inv f)"
by (blast intro!: surjI inv_into_f_f)
lemma surj_f_inv_f: "surj f ⟹ f (inv f y) = y"
by (simp add: f_inv_into_f)
lemma bij_inv_eq_iff: "bij p ⟹ x = inv p y ⟷ p x = y"
using surj_f_inv_f[of p] by (auto simp add: bij_def)
lemma inv_into_injective:
assumes eq: "inv_into A f x = inv_into A f y"
and x: "x ∈ f`A"
and y: "y ∈ f`A"
shows "x = y"
proof -
from eq have "f (inv_into A f x) = f (inv_into A f y)"
by simp
with x y show ?thesis
by (simp add: f_inv_into_f)
qed
lemma inj_on_inv_into: "B ⊆ f`A ⟹ inj_on (inv_into A f) B"
by (blast intro: inj_onI dest: inv_into_injective injD)
lemma inj_imp_bij_betw_inv: "inj f ⟹ bij_betw (inv f) (f ` M) M"
by (simp add: bij_betw_def image_subsetI inj_on_inv_into)
lemma bij_betw_inv_into: "bij_betw f A B ⟹ bij_betw (inv_into A f) B A"
by (auto simp add: bij_betw_def inj_on_inv_into)
lemma surj_imp_inj_inv: "surj f ⟹ inj (inv f)"
by (simp add: inj_on_inv_into)
lemma surj_iff: "surj f ⟷ f ∘ inv f = id"
by (auto intro!: surjI simp: surj_f_inv_f fun_eq_iff[where 'b='a])
lemma surj_iff_all: "surj f ⟷ (∀x. f (inv f x) = x)"
by (simp add: o_def surj_iff fun_eq_iff)
lemma surj_imp_inv_eq:
assumes "surj f" and gf: "⋀x. g (f x) = x"
shows "inv f = g"
proof (rule ext)
fix x
have "g (f (inv f x)) = inv f x"
by (rule gf)
then show "inv f x = g x"
by (simp add: surj_f_inv_f ‹surj f›)
qed
lemma bij_imp_bij_inv: "bij f ⟹ bij (inv f)"
by (simp add: bij_def inj_imp_surj_inv surj_imp_inj_inv)
lemma inv_equality: "(⋀x. g (f x) = x) ⟹ (⋀y. f (g y) = y) ⟹ inv f = g"
by (rule ext) (auto simp add: inv_into_def)
lemma inv_inv_eq: "bij f ⟹ inv (inv f) = f"
by (rule inv_equality) (auto simp add: bij_def surj_f_inv_f)
text ‹
‹bij (inv f)› implies little about ‹f›. Consider ‹f :: bool ⇒ bool› such
that ‹f True = f False = True›. Then it ia consistent with axiom ‹someI›
that ‹inv f› could be any function at all, including the identity function.
If ‹inv f = id› then ‹inv f› is a bijection, but ‹inj f›, ‹surj f› and ‹inv
(inv f) = f› all fail.
›
lemma inv_into_comp:
"inj_on f (g ` A) ⟹ inj_on g A ⟹ x ∈ f ` g ` A ⟹
inv_into A (f ∘ g) x = (inv_into A g ∘ inv_into (g ` A) f) x"
by (auto simp: f_inv_into_f inv_into_into intro: inv_into_f_eq comp_inj_on)
lemma o_inv_distrib: "bij f ⟹ bij g ⟹ inv (f ∘ g) = inv g ∘ inv f"
by (rule inv_equality) (auto simp add: bij_def surj_f_inv_f)
lemma image_f_inv_f: "surj f ⟹ f ` (inv f ` A) = A"
by (simp add: surj_f_inv_f image_comp comp_def)
lemma image_inv_f_f: "inj f ⟹ inv f ` (f ` A) = A"
by simp
lemma bij_image_Collect_eq:
assumes "bij f"
shows "f ` Collect P = {y. P (inv f y)}"
proof
show "f ` Collect P ⊆ {y. P (inv f y)}"
using assms by (force simp add: bij_is_inj)
show "{y. P (inv f y)} ⊆ f ` Collect P"
using assms by (blast intro: bij_is_surj [THEN surj_f_inv_f, symmetric])
qed
lemma bij_vimage_eq_inv_image:
assumes "bij f"
shows "f -` A = inv f ` A"
proof
show "f -` A ⊆ inv f ` A"
using assms by (blast intro: bij_is_inj [THEN inv_into_f_f, symmetric])
show "inv f ` A ⊆ f -` A"
using assms by (auto simp add: bij_is_surj [THEN surj_f_inv_f])
qed
lemma inv_fn_o_fn_is_id:
fixes f::"'a ⇒ 'a"
assumes "bij f"
shows "((inv f)^^n) o (f^^n) = (λx. x)"
proof -
have "((inv f)^^n)((f^^n) x) = x" for x n
proof (induction n)
case (Suc n)
have *: "(inv f) (f y) = y" for y
by (simp add: assms bij_is_inj)
have "(inv f ^^ Suc n) ((f ^^ Suc n) x) = (inv f^^n) (inv f (f ((f^^n) x)))"
by (simp add: funpow_swap1)
also have "... = (inv f^^n) ((f^^n) x)"
using * by auto
also have "... = x" using Suc.IH by auto
finally show ?case by simp
qed (auto)
then show ?thesis unfolding o_def by blast
qed
lemma fn_o_inv_fn_is_id:
fixes f::"'a ⇒ 'a"
assumes "bij f"
shows "(f^^n) o ((inv f)^^n) = (λx. x)"
proof -
have "(f^^n) (((inv f)^^n) x) = x" for x n
proof (induction n)
case (Suc n)
have *: "f(inv f y) = y" for y
using bij_inv_eq_iff[OF assms] by auto
have "(f ^^ Suc n) ((inv f ^^ Suc n) x) = (f^^n) (f (inv f ((inv f^^n) x)))"
by (simp add: funpow_swap1)
also have "... = (f^^n) ((inv f^^n) x)"
using * by auto
also have "... = x" using Suc.IH by auto
finally show ?case by simp
qed (auto)
then show ?thesis unfolding o_def by blast
qed
lemma inv_fn:
fixes f::"'a ⇒ 'a"
assumes "bij f"
shows "inv (f^^n) = ((inv f)^^n)"
proof -
have "inv (f^^n) x = ((inv f)^^n) x" for x
proof (rule inv_into_f_eq)
show "inj (f ^^ n)"
by (simp add: inj_fn[OF bij_is_inj [OF assms]])
show "(f ^^ n) ((inv f ^^ n) x) = x"
using fn_o_inv_fn_is_id[OF assms, THEN fun_cong] by force
qed auto
then show ?thesis by auto
qed
lemma funpow_inj_finite:
assumes ‹inj p› ‹finite {y. ∃n. y = (p ^^ n) x}›
obtains n where ‹n > 0› ‹(p ^^ n) x = x›
proof -
have ‹infinite (UNIV :: nat set)›
by simp
moreover have ‹{y. ∃n. y = (p ^^ n) x} = (λn. (p ^^ n) x) ` UNIV›
by auto
with assms have ‹finite …›
by simp
ultimately have "∃n ∈ UNIV. ¬ finite {m ∈ UNIV. (p ^^ m) x = (p ^^ n) x}"
by (rule pigeonhole_infinite)
then obtain n where "infinite {m. (p ^^ m) x = (p ^^ n) x}" by auto
then have "infinite ({m. (p ^^ m) x = (p ^^ n) x} - {n})" by auto
then have "({m. (p ^^ m) x = (p ^^ n) x} - {n}) ≠ {}"
by (auto simp add: subset_singleton_iff)
then obtain m where m: "(p ^^ m) x = (p ^^ n) x" "m ≠ n" by auto
{ fix m n assume "(p ^^ n) x = (p ^^ m) x" "m < n"
have "(p ^^ (n - m)) x = inv (p ^^ m) ((p ^^ m) ((p ^^ (n - m)) x))"
using ‹inj p› by (simp add: inv_f_f)
also have "((p ^^ m) ((p ^^ (n - m)) x)) = (p ^^ n) x"
using ‹m < n› funpow_add [of m ‹n - m› p] by simp
also have "inv (p ^^ m) … = x"
using ‹inj p› by (simp add: ‹(p ^^ n) x = _›)
finally have "(p ^^ (n - m)) x = x" "0 < n - m"
using ‹m < n› by auto }
note general = this
show thesis
proof (cases m n rule: linorder_cases)
case less
then have ‹n - m > 0› ‹(p ^^ (n - m)) x = x›
using general [of n m] m by simp_all
then show thesis by (blast intro: that)
next
case equal
then show thesis using m by simp
next
case greater
then have ‹m - n > 0› ‹(p ^^ (m - n)) x = x›
using general [of m n] m by simp_all
then show thesis by (blast intro: that)
qed
qed
lemma mono_inv:
fixes f::"'a::linorder ⇒ 'b::linorder"
assumes "mono f" "bij f"
shows "mono (inv f)"
proof
fix x y::'b assume "x ≤ y"
from ‹bij f› obtain a b where x: "x = f a" and y: "y = f b" by(fastforce simp: bij_def surj_def)
show "inv f x ≤ inv f y"
proof (rule le_cases)
assume "a ≤ b"
thus ?thesis using ‹bij f› x y by(simp add: bij_def inv_f_f)
next
assume "b ≤ a"
hence "f b ≤ f a" by(rule monoD[OF ‹mono f›])
hence "y ≤ x" using x y by simp
hence "x = y" using ‹x ≤ y› by auto
thus ?thesis by simp
qed
qed
lemma strict_mono_inv_on_range:
fixes f :: "'a::linorder ⇒ 'b::order"
assumes "strict_mono f"
shows "strict_mono_on (range f) (inv f)"
proof (clarsimp simp: strict_mono_on_def)
fix x y
assume "f x < f y"
then show "inv f (f x) < inv f (f y)"
using assms strict_mono_imp_inj_on strict_mono_less by fastforce
qed
lemma mono_bij_Inf:
fixes f :: "'a::complete_linorder ⇒ 'b::complete_linorder"
assumes "mono f" "bij f"
shows "f (Inf A) = Inf (f`A)"
proof -
have "surj f" using ‹bij f› by (auto simp: bij_betw_def)
have *: "(inv f) (Inf (f`A)) ≤ Inf ((inv f)`(f`A))"
using mono_Inf[OF mono_inv[OF assms], of "f`A"] by simp
have "Inf (f`A) ≤ f (Inf ((inv f)`(f`A)))"
using monoD[OF ‹mono f› *] by(simp add: surj_f_inv_f[OF ‹surj f›])
also have "... = f(Inf A)"
using assms by (simp add: bij_is_inj)
finally show ?thesis using mono_Inf[OF assms(1), of A] by auto
qed
lemma finite_fun_UNIVD1:
assumes fin: "finite (UNIV :: ('a ⇒ 'b) set)"
and card: "card (UNIV :: 'b set) ≠ Suc 0"
shows "finite (UNIV :: 'a set)"
proof -
let ?UNIV_b = "UNIV :: 'b set"
from fin have "finite ?UNIV_b"
by (rule finite_fun_UNIVD2)
with card have "card ?UNIV_b ≥ Suc (Suc 0)"
by (cases "card ?UNIV_b") (auto simp: card_eq_0_iff)
then have "card ?UNIV_b = Suc (Suc (card ?UNIV_b - Suc (Suc 0)))"
by simp
then obtain b1 b2 :: 'b where b1b2: "b1 ≠ b2"
by (auto simp: card_Suc_eq)
from fin have fin': "finite (range (λf :: 'a ⇒ 'b. inv f b1))"
by (rule finite_imageI)
have "UNIV = range (λf :: 'a ⇒ 'b. inv f b1)"
proof (rule UNIV_eq_I)
fix x :: 'a
from b1b2 have "x = inv (λy. if y = x then b1 else b2) b1"
by (simp add: inv_into_def)
then show "x ∈ range (λf::'a ⇒ 'b. inv f b1)"
by blast
qed
with fin' show ?thesis
by simp
qed
text ‹
Every infinite set contains a countable subset. More precisely we
show that a set ‹S› is infinite if and only if there exists an
injective function from the naturals into ‹S›.
The ``only if'' direction is harder because it requires the
construction of a sequence of pairwise different elements of an
infinite set ‹S›. The idea is to construct a sequence of
non-empty and infinite subsets of ‹S› obtained by successively
removing elements of ‹S›.
›
lemma infinite_countable_subset:
assumes inf: "¬ finite S"
shows "∃f::nat ⇒ 'a. inj f ∧ range f ⊆ S"
proof -
define Sseq where "Sseq = rec_nat S (λn T. T - {SOME e. e ∈ T})"
define pick where "pick n = (SOME e. e ∈ Sseq n)" for n
have *: "Sseq n ⊆ S" "¬ finite (Sseq n)" for n
by (induct n) (auto simp: Sseq_def inf)
then have **: "⋀n. pick n ∈ Sseq n"
unfolding pick_def by (subst (asm) finite.simps) (auto simp add: ex_in_conv intro: someI_ex)
with * have "range pick ⊆ S" by auto
moreover have "pick n ≠ pick (n + Suc m)" for m n
proof -
have "pick n ∉ Sseq (n + Suc m)"
by (induct m) (auto simp add: Sseq_def pick_def)
with ** show ?thesis by auto
qed
then have "inj pick"
by (intro linorder_injI) (auto simp add: less_iff_Suc_add)
ultimately show ?thesis by blast
qed
lemma infinite_iff_countable_subset: "¬ finite S ⟷ (∃f::nat ⇒ 'a. inj f ∧ range f ⊆ S)"
using finite_imageD finite_subset infinite_UNIV_char_0 infinite_countable_subset by auto
lemma image_inv_into_cancel:
assumes surj: "f`A = A'"
and sub: "B' ⊆ A'"
shows "f `((inv_into A f)`B') = B'"
using assms
proof (auto simp: f_inv_into_f)
let ?f' = "inv_into A f"
fix a'
assume *: "a' ∈ B'"
with sub have "a' ∈ A'" by auto
with surj have "a' = f (?f' a')"
by (auto simp: f_inv_into_f)
with * show "a' ∈ f ` (?f' ` B')" by blast
qed
lemma inv_into_inv_into_eq:
assumes "bij_betw f A A'"
and a: "a ∈ A"
shows "inv_into A' (inv_into A f) a = f a"
proof -
let ?f' = "inv_into A f"
let ?f'' = "inv_into A' ?f'"
from assms have *: "bij_betw ?f' A' A"
by (auto simp: bij_betw_inv_into)
with a obtain a' where a': "a' ∈ A'" "?f' a' = a"
unfolding bij_betw_def by force
with a * have "?f'' a = a'"
by (auto simp: f_inv_into_f bij_betw_def)
moreover from assms a' have "f a = a'"
by (auto simp: bij_betw_def)
ultimately show "?f'' a = f a" by simp
qed
lemma inj_on_iff_surj:
assumes "A ≠ {}"
shows "(∃f. inj_on f A ∧ f ` A ⊆ A') ⟷ (∃g. g ` A' = A)"
proof safe
fix f
assume inj: "inj_on f A" and incl: "f ` A ⊆ A'"
let ?phi = "λa' a. a ∈ A ∧ f a = a'"
let ?csi = "λa. a ∈ A"
let ?g = "λa'. if a' ∈ f ` A then (SOME a. ?phi a' a) else (SOME a. ?csi a)"
have "?g ` A' = A"
proof
show "?g ` A' ⊆ A"
proof clarify
fix a'
assume *: "a' ∈ A'"
show "?g a' ∈ A"
proof (cases "a' ∈ f ` A")
case True
then obtain a where "?phi a' a" by blast
then have "?phi a' (SOME a. ?phi a' a)"
using someI[of "?phi a'" a] by blast
with True show ?thesis by auto
next
case False
with assms have "?csi (SOME a. ?csi a)"
using someI_ex[of ?csi] by blast
with False show ?thesis by auto
qed
qed
next
show "A ⊆ ?g ` A'"
proof -
have "?g (f a) = a ∧ f a ∈ A'" if a: "a ∈ A" for a
proof -
let ?b = "SOME aa. ?phi (f a) aa"
from a have "?phi (f a) a" by auto
then have *: "?phi (f a) ?b"
using someI[of "?phi(f a)" a] by blast
then have "?g (f a) = ?b" using a by auto
moreover from inj * a have "a = ?b"
by (auto simp add: inj_on_def)
ultimately have "?g(f a) = a" by simp
with incl a show ?thesis by auto
qed
then show ?thesis by force
qed
qed
then show "∃g. g ` A' = A" by blast
next
fix g
let ?f = "inv_into A' g"
have "inj_on ?f (g ` A')"
by (auto simp: inj_on_inv_into)
moreover have "?f (g a') ∈ A'" if a': "a' ∈ A'" for a'
proof -
let ?phi = "λ b'. b' ∈ A' ∧ g b' = g a'"
from a' have "?phi a'" by auto
then have "?phi (SOME b'. ?phi b')"
using someI[of ?phi] by blast
then show ?thesis by (auto simp: inv_into_def)
qed
ultimately show "∃f. inj_on f (g ` A') ∧ f ` g ` A' ⊆ A'"
by auto
qed
lemma Ex_inj_on_UNION_Sigma:
"∃f. (inj_on f (⋃i ∈ I. A i) ∧ f ` (⋃i ∈ I. A i) ⊆ (SIGMA i : I. A i))"
proof
let ?phi = "λa i. i ∈ I ∧ a ∈ A i"
let ?sm = "λa. SOME i. ?phi a i"
let ?f = "λa. (?sm a, a)"
have "inj_on ?f (⋃i ∈ I. A i)"
by (auto simp: inj_on_def)
moreover
have "?sm a ∈ I ∧ a ∈ A(?sm a)" if "i ∈ I" and "a ∈ A i" for i a
using that someI[of "?phi a" i] by auto
then have "?f ` (⋃i ∈ I. A i) ⊆ (SIGMA i : I. A i)"
by auto
ultimately show "inj_on ?f (⋃i ∈ I. A i) ∧ ?f ` (⋃i ∈ I. A i) ⊆ (SIGMA i : I. A i)"
by auto
qed
lemma inv_unique_comp:
assumes fg: "f ∘ g = id"
and gf: "g ∘ f = id"
shows "inv f = g"
using fg gf inv_equality[of g f] by (auto simp add: fun_eq_iff)
lemma subset_image_inj:
"S ⊆ f ` T ⟷ (∃U. U ⊆ T ∧ inj_on f U ∧ S = f ` U)"
proof safe
show "∃U⊆T. inj_on f U ∧ S = f ` U"
if "S ⊆ f ` T"
proof -
from that [unfolded subset_image_iff subset_iff]
obtain g where g: "⋀x. x ∈ S ⟹ g x ∈ T ∧ x = f (g x)"
by (auto simp add: image_iff Bex_def choice_iff')
show ?thesis
proof (intro exI conjI)
show "g ` S ⊆ T"
by (simp add: g image_subsetI)
show "inj_on f (g ` S)"
using g by (auto simp: inj_on_def)
show "S = f ` (g ` S)"
using g image_subset_iff by auto
qed
qed
qed blast
subsection ‹Other Consequences of Hilbert's Epsilon›
text ‹Hilbert's Epsilon and the \<^term>‹split› Operator›
text ‹Looping simprule!›
lemma split_paired_Eps: "(SOME x. P x) = (SOME (a, b). P (a, b))"
by simp
lemma Eps_case_prod: "Eps (case_prod P) = (SOME xy. P (fst xy) (snd xy))"
by (simp add: split_def)
lemma Eps_case_prod_eq [simp]: "(SOME (x', y'). x = x' ∧ y = y') = (x, y)"
by blast
text ‹A relation is wellfounded iff it has no infinite descending chain.›
lemma wf_iff_no_infinite_down_chain: "wf r ⟷ (∄f. ∀i. (f (Suc i), f i) ∈ r)"
(is "_ ⟷ ¬ ?ex")
proof
assume "wf r"
show "¬ ?ex"
proof
assume ?ex
then obtain f where f: "(f (Suc i), f i) ∈ r" for i
by blast
from ‹wf r› have minimal: "x ∈ Q ⟹ ∃z∈Q. ∀y. (y, z) ∈ r ⟶ y ∉ Q" for x Q
by (auto simp: wf_eq_minimal)
let ?Q = "{w. ∃i. w = f i}"
fix n
have "f n ∈ ?Q" by blast
from minimal [OF this] obtain j where "(y, f j) ∈ r ⟹ y ∉ ?Q" for y by blast
with this [OF ‹(f (Suc j), f j) ∈ r›] have "f (Suc j) ∉ ?Q" by simp
then show False by blast
qed
next
assume "¬ ?ex"
then show "wf r"
proof (rule contrapos_np)
assume "¬ wf r"
then obtain Q x where x: "x ∈ Q" and rec: "z ∈ Q ⟹ ∃y. (y, z) ∈ r ∧ y ∈ Q" for z
by (auto simp add: wf_eq_minimal)
obtain descend :: "nat ⇒ 'a"
where descend_0: "descend 0 = x"
and descend_Suc: "descend (Suc n) = (SOME y. y ∈ Q ∧ (y, descend n) ∈ r)" for n
by (rule that [of "rec_nat x (λ_ rec. (SOME y. y ∈ Q ∧ (y, rec) ∈ r))"]) simp_all
have descend_Q: "descend n ∈ Q" for n
proof (induct n)
case 0
with x show ?case by (simp only: descend_0)
next
case Suc
then show ?case by (simp only: descend_Suc) (rule someI2_ex; use rec in blast)
qed
have "(descend (Suc i), descend i) ∈ r" for i
by (simp only: descend_Suc) (rule someI2_ex; use descend_Q rec in blast)
then show "∃f. ∀i. (f (Suc i), f i) ∈ r" by blast
qed
qed
lemma wf_no_infinite_down_chainE:
assumes "wf r"
obtains k where "(f (Suc k), f k) ∉ r"
using assms wf_iff_no_infinite_down_chain[of r] by blast
text ‹A dynamically-scoped fact for TFL›
lemma tfl_some: "∀P x. P x ⟶ P (Eps P)"
by (blast intro: someI)
subsection ‹An aside: bounded accessible part›
text ‹Finite monotone eventually stable sequences›
lemma finite_mono_remains_stable_implies_strict_prefix:
fixes f :: "nat ⇒ 'a::order"
assumes S: "finite (range f)" "mono f"
and eq: "∀n. f n = f (Suc n) ⟶ f (Suc n) = f (Suc (Suc n))"
shows "∃N. (∀n≤N. ∀m≤N. m < n ⟶ f m < f n) ∧ (∀n≥N. f N = f n)"
using assms
proof -
have "∃n. f n = f (Suc n)"
proof (rule ccontr)
assume "¬ ?thesis"
then have "⋀n. f n ≠ f (Suc n)" by auto
with ‹mono f› have "⋀n. f n < f (Suc n)"
by (auto simp: le_less mono_iff_le_Suc)
with lift_Suc_mono_less_iff[of f] have *: "⋀n m. n < m ⟹ f n < f m"
by auto
have "inj f"
proof (intro injI)
fix x y
assume "f x = f y"
then show "x = y"
by (cases x y rule: linorder_cases) (auto dest: *)
qed
with ‹finite (range f)› have "finite (UNIV::nat set)"
by (rule finite_imageD)
then show False by simp
qed
then obtain n where n: "f n = f (Suc n)" ..
define N where "N = (LEAST n. f n = f (Suc n))"
have N: "f N = f (Suc N)"
unfolding N_def using n by (rule LeastI)
show ?thesis
proof (intro exI[of _ N] conjI allI impI)
fix n
assume "N ≤ n"
then have "⋀m. N ≤ m ⟹ m ≤ n ⟹ f m = f N"
proof (induct rule: dec_induct)
case base
then show ?case by simp
next
case (step n)
then show ?case
using eq [rule_format, of "n - 1"] N
by (cases n) (auto simp add: le_Suc_eq)
qed
from this[of n] ‹N ≤ n› show "f N = f n" by auto
next
fix n m :: nat
assume "m < n" "n ≤ N"
then show "f m < f n"
proof (induct rule: less_Suc_induct)
case (1 i)
then have "i < N" by simp
then have "f i ≠ f (Suc i)"
unfolding N_def by (rule not_less_Least)
with ‹mono f› show ?case by (simp add: mono_iff_le_Suc less_le)
next
case 2
then show ?case by simp
qed
qed
qed
lemma finite_mono_strict_prefix_implies_finite_fixpoint:
fixes f :: "nat ⇒ 'a set"
assumes S: "⋀i. f i ⊆ S" "finite S"
and ex: "∃N. (∀n≤N. ∀m≤N. m < n ⟶ f m ⊂ f n) ∧ (∀n≥N. f N = f n)"
shows "f (card S) = (⋃n. f n)"
proof -
from ex obtain N where inj: "⋀n m. n ≤ N ⟹ m ≤ N ⟹ m < n ⟹ f m ⊂ f n"
and eq: "∀n≥N. f N = f n"
by atomize auto
have "i ≤ N ⟹ i ≤ card (f i)" for i
proof (induct i)
case 0
then show ?case by simp
next
case (Suc i)
with inj [of "Suc i" i] have "(f i) ⊂ (f (Suc i))" by auto
moreover have "finite (f (Suc i))" using S by (rule finite_subset)
ultimately have "card (f i) < card (f (Suc i))" by (intro psubset_card_mono)
with Suc inj show ?case by auto
qed
then have "N ≤ card (f N)" by simp
also have "… ≤ card S" using S by (intro card_mono)
finally have §: "f (card S) = f N" using eq by auto
moreover have "⋃ (range f) ⊆ f N"
proof clarify
fix x n
assume "x ∈ f n"
with eq inj [of N] show "x ∈ f N"
by (cases "n < N") (auto simp: not_less)
qed
ultimately show ?thesis
by auto
qed
subsection ‹More on injections, bijections, and inverses›
locale bijection =
fixes f :: "'a ⇒ 'a"
assumes bij: "bij f"
begin
lemma bij_inv: "bij (inv f)"
using bij by (rule bij_imp_bij_inv)
lemma surj [simp]: "surj f"
using bij by (rule bij_is_surj)
lemma inj: "inj f"
using bij by (rule bij_is_inj)
lemma surj_inv [simp]: "surj (inv f)"
using inj by (rule inj_imp_surj_inv)
lemma inj_inv: "inj (inv f)"
using surj by (rule surj_imp_inj_inv)
lemma eqI: "f a = f b ⟹ a = b"
using inj by (rule injD)
lemma eq_iff [simp]: "f a = f b ⟷ a = b"
by (auto intro: eqI)
lemma eq_invI: "inv f a = inv f b ⟹ a = b"
using inj_inv by (rule injD)
lemma eq_inv_iff [simp]: "inv f a = inv f b ⟷ a = b"
by (auto intro: eq_invI)
lemma inv_left [simp]: "inv f (f a) = a"
using inj by (simp add: inv_f_eq)
lemma inv_comp_left [simp]: "inv f ∘ f = id"
by (simp add: fun_eq_iff)
lemma inv_right [simp]: "f (inv f a) = a"
using surj by (simp add: surj_f_inv_f)
lemma inv_comp_right [simp]: "f ∘ inv f = id"
by (simp add: fun_eq_iff)
lemma inv_left_eq_iff [simp]: "inv f a = b ⟷ f b = a"
by auto
lemma inv_right_eq_iff [simp]: "b = inv f a ⟷ f b = a"
by auto
end
lemma infinite_imp_bij_betw:
assumes infinite: "¬ finite A"
shows "∃h. bij_betw h A (A - {a})"
proof (cases "a ∈ A")
case False
then have "A - {a} = A" by blast
then show ?thesis
using bij_betw_id[of A] by auto
next
case True
with infinite have "¬ finite (A - {a})" by auto
with infinite_iff_countable_subset[of "A - {a}"]
obtain f :: "nat ⇒ 'a" where "inj f" and f: "f ` UNIV ⊆ A - {a}" by blast
define g where "g n = (if n = 0 then a else f (Suc n))" for n
define A' where "A' = g ` UNIV"
have *: "∀y. f y ≠ a" using f by blast
have 3: "inj_on g UNIV ∧ g ` UNIV ⊆ A ∧ a ∈ g ` UNIV"
using ‹inj f› f * unfolding inj_on_def g_def
by (auto simp add: True image_subset_iff)
then have 4: "bij_betw g UNIV A' ∧ a ∈ A' ∧ A' ⊆ A"
using inj_on_imp_bij_betw[of g] by (auto simp: A'_def)
then have 5: "bij_betw (inv g) A' UNIV"
by (auto simp add: bij_betw_inv_into)
from 3 obtain n where n: "g n = a" by auto
have 6: "bij_betw g (UNIV - {n}) (A' - {a})"
by (rule bij_betw_subset) (use 3 4 n in ‹auto simp: image_set_diff A'_def›)
define v where "v m = (if m < n then m else Suc m)" for m
have "m < n ∨ m = n" if "⋀k. k < n ∨ m ≠ Suc k" for m
using that [of "m-1"] by auto
then have 7: "bij_betw v UNIV (UNIV - {n})"
unfolding bij_betw_def inj_on_def v_def by auto
define h' where "h' = g ∘ v ∘ (inv g)"
with 5 6 7 have 8: "bij_betw h' A' (A' - {a})"
by (auto simp add: bij_betw_trans)
define h where "h b = (if b ∈ A' then h' b else b)" for b
with 8 have "bij_betw h A' (A' - {a})"
using bij_betw_cong[of A' h] by auto
moreover
have "∀b ∈ A - A'. h b = b" by (auto simp: h_def)
then have "bij_betw h (A - A') (A - A')"
using bij_betw_cong[of "A - A'" h id] bij_betw_id[of "A - A'"] by auto
moreover
from 4 have "(A' ∩ (A - A') = {} ∧ A' ∪ (A - A') = A) ∧
((A' - {a}) ∩ (A - A') = {} ∧ (A' - {a}) ∪ (A - A') = A - {a})"
by blast
ultimately have "bij_betw h A (A - {a})"
using bij_betw_combine[of h A' "A' - {a}" "A - A'" "A - A'"] by simp
then show ?thesis by blast
qed
lemma infinite_imp_bij_betw2:
assumes "¬ finite A"
shows "∃h. bij_betw h A (A ∪ {a})"
proof (cases "a ∈ A")
case True
then have "A ∪ {a} = A" by blast
then show ?thesis using bij_betw_id[of A] by auto
next
case False
let ?A' = "A ∪ {a}"
from False have "A = ?A' - {a}" by blast
moreover from assms have "¬ finite ?A'" by auto
ultimately obtain f where "bij_betw f ?A' A"
using infinite_imp_bij_betw[of ?A' a] by auto
then have "bij_betw (inv_into ?A' f) A ?A'" by (rule bij_betw_inv_into)
then show ?thesis by auto
qed
lemma bij_betw_inv_into_left: "bij_betw f A A' ⟹ a ∈ A ⟹ inv_into A f (f a) = a"
unfolding bij_betw_def by clarify (rule inv_into_f_f)
lemma bij_betw_inv_into_right: "bij_betw f A A' ⟹ a' ∈ A' ⟹ f (inv_into A f a') = a'"
unfolding bij_betw_def using f_inv_into_f by force
lemma bij_betw_inv_into_subset:
"bij_betw f A A' ⟹ B ⊆ A ⟹ f ` B = B' ⟹ bij_betw (inv_into A f) B' B"
by (auto simp: bij_betw_def intro: inj_on_inv_into)
subsection ‹Specification package -- Hilbertized version›
lemma exE_some: "Ex P ⟹ c ≡ Eps P ⟹ P c"
by (simp only: someI_ex)
ML_file ‹Tools/choice_specification.ML›
subsection ‹Complete Distributive Lattices -- Properties depending on Hilbert Choice›
context complete_distrib_lattice
begin
lemma Sup_Inf: "⨆ (Inf ` A) = ⨅ (Sup ` {f ` A |f. ∀B∈A. f B ∈ B})"
proof (rule order.antisym)
show "⨆ (Inf ` A) ≤ ⨅ (Sup ` {f ` A |f. ∀B∈A. f B ∈ B})"
using Inf_lower2 Sup_upper
by (fastforce simp add: intro: Sup_least INF_greatest)
next
show "⨅ (Sup ` {f ` A |f. ∀B∈A. f B ∈ B}) ≤ ⨆ (Inf ` A)"
proof (simp add: Inf_Sup, rule SUP_least, simp, safe)
fix f
assume "∀Y. (∃f. Y = f ` A ∧ (∀Y∈A. f Y ∈ Y)) ⟶ f Y ∈ Y"
then have B: "⋀ F . (∀ Y ∈ A . F Y ∈ Y) ⟹ ∃ Z ∈ A . f (F ` A) = F Z"
by auto
show "⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ ⨆(Inf ` A)"
proof (cases "∃ Z ∈ A . ⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ Inf Z")
case True
from this obtain Z where [simp]: "Z ∈ A" and A: "⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ Inf Z"
by blast
have B: "... ≤ ⨆(Inf ` A)"
by (simp add: SUP_upper)
from A and B show ?thesis
by simp
next
case False
then have X: "⋀ Z . Z ∈ A ⟹ ∃ x . x ∈ Z ∧ ¬ ⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ x"
using Inf_greatest by blast
define F where "F = (λ Z . SOME x . x ∈ Z ∧ ¬ ⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ x)"
have C: "⋀Y. Y ∈ A ⟹ F Y ∈ Y"
using X by (simp add: F_def, rule someI2_ex, auto)
have E: "⋀Y. Y ∈ A ⟹ ¬ ⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ F Y"
using X by (simp add: F_def, rule someI2_ex, auto)
from C and B obtain Z where D: "Z ∈ A " and Y: "f (F ` A) = F Z"
by blast
from E and D have W: "¬ ⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ F Z"
by simp
have "⨅(f ` {f ` A |f. ∀Y∈A. f Y ∈ Y}) ≤ f (F ` A)"
using C by (blast intro: INF_lower)
with W Y show ?thesis
by simp
qed
qed
qed
lemma dual_complete_distrib_lattice:
"class.complete_distrib_lattice Sup Inf sup (≥) (>) inf ⊤ ⊥"
by (simp add: class.complete_distrib_lattice.intro [OF dual_complete_lattice]
class.complete_distrib_lattice_axioms_def Sup_Inf)
lemma sup_Inf: "a ⊔ ⨅B = ⨅((⊔) a ` B)"
proof (rule order.antisym)
show "a ⊔ ⨅B ≤ ⨅((⊔) a ` B)"
using Inf_lower sup.mono by (fastforce intro: INF_greatest)
next
have "⨅((⊔) a ` B) ≤ ⨅(Sup ` {{f {a}, f B} |f. f {a} = a ∧ f B ∈ B})"
by (rule INF_greatest, auto simp add: INF_lower)
also have "... = ⨆(Inf ` {{a}, B})"
by (unfold Sup_Inf, simp)
finally show "⨅((⊔) a ` B) ≤ a ⊔ ⨅B"
by simp
qed
lemma inf_Sup: "a ⊓ ⨆B = ⨆((⊓) a ` B)"
using dual_complete_distrib_lattice
by (rule complete_distrib_lattice.sup_Inf)
lemma INF_SUP: "(⨅y. ⨆x. P x y) = (⨆f. ⨅x. P (f x) x)"
proof (rule order.antisym)
show "(SUP x. INF y. P (x y) y) ≤ (INF y. SUP x. P x y)"
by (rule SUP_least, rule INF_greatest, rule SUP_upper2, simp_all, rule INF_lower2, simp, blast)
next
have "(INF y. SUP x. ((P x y))) ≤ Inf (Sup ` {{P x y | x . True} | y . True })" (is "?A ≤ ?B")
proof (rule INF_greatest, clarsimp)
fix y
have "?A ≤ (SUP x. P x y)"
by (rule INF_lower, simp)
also have "... ≤ Sup {uu. ∃x. uu = P x y}"
by (simp add: full_SetCompr_eq)
finally show "?A ≤ Sup {uu. ∃x. uu = P x y}"
by simp
qed
also have "... ≤ (SUP x. INF y. P (x y) y)"
proof (subst Inf_Sup, rule SUP_least, clarsimp)
fix f
assume A: "∀Y. (∃y. Y = {uu. ∃x. uu = P x y}) ⟶ f Y ∈ Y"
have " ⨅(f ` {uu. ∃y. uu = {uu. ∃x. uu = P x y}}) ≤
(⨅y. P (SOME x. f {P x y |x. True} = P x y) y)"
proof (rule INF_greatest, clarsimp)
fix y
have "(INF x∈{uu. ∃y. uu = {uu. ∃x. uu = P x y}}. f x) ≤ f {uu. ∃x. uu = P x y}"
by (rule INF_lower, blast)
also have "... ≤ P (SOME x. f {uu . ∃x. uu = P x y} = P x y) y"
by (rule someI2_ex) (use A in auto)
finally show "⨅(f ` {uu. ∃y. uu = {uu. ∃x. uu = P x y}}) ≤
P (SOME x. f {uu. ∃x. uu = P x y} = P x y) y"
by simp
qed
also have "... ≤ (SUP x. INF y. P (x y) y)"
by (rule SUP_upper, simp)
finally show "⨅(f ` {uu. ∃y. uu = {uu. ∃x. uu = P x y}}) ≤ (⨆x. ⨅y. P (x y) y)"
by simp
qed
finally show "(INF y. SUP x. P x y) ≤ (SUP x. INF y. P (x y) y)"
by simp
qed
lemma INF_SUP_set: "(⨅B∈A. ⨆(g ` B)) = (⨆B∈{f ` A |f. ∀C∈A. f C ∈ C}. ⨅(g ` B))"
(is "_ = (⨆B∈?F. _)")
proof (rule order.antisym)
have "⨅ ((g ∘ f) ` A) ≤ ⨆ (g ` B)" if "⋀B. B ∈ A ⟹ f B ∈ B" "B ∈ A" for f B
using that by (auto intro: SUP_upper2 INF_lower2)
then show "(⨆x∈?F. ⨅a∈x. g a) ≤ (⨅x∈A. ⨆a∈x. g a)"
by (auto intro!: SUP_least INF_greatest simp add: image_comp)
next
show "(⨅x∈A. ⨆a∈x. g a) ≤ (⨆x∈?F. ⨅a∈x. g a)"
proof (cases "{} ∈ A")
case True
then show ?thesis
by (rule INF_lower2) simp_all
next
case False
{fix x
have "(⨅x∈A. ⨆x∈x. g x) ≤ (⨆u. if x ∈ A then if u ∈ x then g u else ⊥ else ⊤)"
proof (cases "x ∈ A")
case True
then show ?thesis
by (intro INF_lower2 SUP_least SUP_upper2) auto
qed auto
}
then have "(⨅Y∈A. ⨆a∈Y. g a) ≤ (⨅Y. ⨆y. if Y ∈ A then if y ∈ Y then g y else ⊥ else ⊤)"
by (rule INF_greatest)
also have "... = (⨆x. ⨅Y. if Y ∈ A then if x Y ∈ Y then g (x Y) else ⊥ else ⊤)"
by (simp only: INF_SUP)
also have "... ≤ (⨆x∈?F. ⨅a∈x. g a)"
proof (rule SUP_least)
show "(⨅B. if B ∈ A then if x B ∈ B then g (x B) else ⊥ else ⊤)
≤ (⨆x∈?F. ⨅x∈x. g x)" for x
proof -
define G where "G ≡ λY. if x Y ∈ Y then x Y else (SOME x. x ∈Y)"
have "∀Y∈A. G Y ∈ Y"
using False some_in_eq G_def by auto
then have A: "G ` A ∈ ?F"
by blast
show "(⨅Y. if Y ∈ A then if x Y ∈ Y then g (x Y) else ⊥ else ⊤) ≤ (⨆x∈?F. ⨅x∈x. g x)"
by (fastforce simp: G_def intro: SUP_upper2 [OF A] INF_greatest INF_lower2)
qed
qed
finally show ?thesis by simp
qed
qed
lemma SUP_INF: "(⨆y. ⨅x. P x y) = (⨅x. ⨆y. P (x y) y)"
using dual_complete_distrib_lattice
by (rule complete_distrib_lattice.INF_SUP)
lemma SUP_INF_set: "(⨆x∈A. ⨅ (g ` x)) = (⨅x∈{f ` A |f. ∀Y∈A. f Y ∈ Y}. ⨆ (g ` x))"
using dual_complete_distrib_lattice
by (rule complete_distrib_lattice.INF_SUP_set)
end
context complete_distrib_lattice
begin
lemma sup_INF: "a ⊔ (⨅b∈B. f b) = (⨅b∈B. a ⊔ f b)"
by (simp add: sup_Inf image_comp)
lemma inf_SUP: "a ⊓ (⨆b∈B. f b) = (⨆b∈B. a ⊓ f b)"
by (simp add: inf_Sup image_comp)
lemma Inf_sup: "⨅B ⊔ a = (⨅b∈B. b ⊔ a)"
by (simp add: sup_Inf sup_commute)
lemma Sup_inf: "⨆B ⊓ a = (⨆b∈B. b ⊓ a)"
by (simp add: inf_Sup inf_commute)
lemma INF_sup: "(⨅b∈B. f b) ⊔ a = (⨅b∈B. f b ⊔ a)"
by (simp add: sup_INF sup_commute)
lemma SUP_inf: "(⨆b∈B. f b) ⊓ a = (⨆b∈B. f b ⊓ a)"
by (simp add: inf_SUP inf_commute)
lemma Inf_sup_eq_top_iff: "(⨅B ⊔ a = ⊤) ⟷ (∀b∈B. b ⊔ a = ⊤)"
by (simp only: Inf_sup INF_top_conv)
lemma Sup_inf_eq_bot_iff: "(⨆B ⊓ a = ⊥) ⟷ (∀b∈B. b ⊓ a = ⊥)"
by (simp only: Sup_inf SUP_bot_conv)
lemma INF_sup_distrib2: "(⨅a∈A. f a) ⊔ (⨅b∈B. g b) = (⨅a∈A. ⨅b∈B. f a ⊔ g b)"
by (subst INF_commute) (simp add: sup_INF INF_sup)
lemma SUP_inf_distrib2: "(⨆a∈A. f a) ⊓ (⨆b∈B. g b) = (⨆a∈A. ⨆b∈B. f a ⊓ g b)"
by (subst SUP_commute) (simp add: inf_SUP SUP_inf)
end
instantiation set :: (type) complete_distrib_lattice
begin
instance proof (standard, clarsimp)
fix A :: "(('a set) set) set"
fix x::'a
assume A: "∀𝒮∈A. ∃X∈𝒮. x ∈ X"
define F where "F ≡ λY. SOME X. Y ∈ A ∧ X ∈ Y ∧ x ∈ X"
have "(∀S ∈ F ` A. x ∈ S)"
using A unfolding F_def by (fastforce intro: someI2_ex)
moreover have "∀Y∈A. F Y ∈ Y"
using A unfolding F_def by (fastforce intro: someI2_ex)
then have "∃f. F ` A = f ` A ∧ (∀Y∈A. f Y ∈ Y)"
by blast
ultimately show "∃X. (∃f. X = f ` A ∧ (∀Y∈A. f Y ∈ Y)) ∧ (∀S∈X. x ∈ S)"
by auto
qed
end
instance set :: (type) complete_boolean_algebra ..
instantiation "fun" :: (type, complete_distrib_lattice) complete_distrib_lattice
begin
instance by standard (simp add: le_fun_def INF_SUP_set image_comp)
end
instance "fun" :: (type, complete_boolean_algebra) complete_boolean_algebra ..
context complete_linorder
begin
subclass complete_distrib_lattice
proof (standard, rule ccontr)
fix A :: "'a set set"
let ?F = "{f ` A |f. ∀Y∈A. f Y ∈ Y}"
assume "¬ ⨅(Sup ` A) ≤ ⨆(Inf ` ?F)"
then have C: "⨅(Sup ` A) > ⨆(Inf ` ?F)"
by (simp add: not_le)
show False
proof (cases "∃ z . ⨅(Sup ` A) > z ∧ z > ⨆(Inf ` ?F)")
case True
then obtain z where A: "z < ⨅(Sup ` A)" and X: "z > ⨆(Inf ` ?F)"
by blast
then have B: "⋀Y. Y ∈ A ⟹ ∃k ∈Y . z < k"
using local.less_Sup_iff by(force dest: less_INF_D)
define G where "G ≡ λY. SOME k . k ∈ Y ∧ z < k"
have E: "⋀Y. Y ∈ A ⟹ G Y ∈ Y"
using B unfolding G_def by (fastforce intro: someI2_ex)
have "z ≤ Inf (G ` A)"
proof (rule INF_greatest)
show "⋀Y. Y ∈ A ⟹ z ≤ G Y"
using B unfolding G_def by (fastforce intro: someI2_ex)
qed
also have "... ≤ ⨆(Inf ` ?F)"
by (rule SUP_upper) (use E in blast)
finally have "z ≤ ⨆(Inf ` ?F)"
by simp
with X show ?thesis
using local.not_less by blast
next
case False
have B: "⋀Y. Y ∈ A ⟹ ∃ k ∈Y . ⨆(Inf ` ?F) < k"
using C local.less_Sup_iff by(force dest: less_INF_D)
define G where "G ≡ λ Y . SOME k . k ∈ Y ∧ ⨆(Inf ` ?F) < k"
have E: "⋀Y. Y ∈ A ⟹ G Y ∈ Y"
using B unfolding G_def by (fastforce intro: someI2_ex)
have "⋀Y. Y ∈ A ⟹ ⨅(Sup ` A) ≤ G Y"
using B False local.leI unfolding G_def by (fastforce intro: someI2_ex)
then have "⨅(Sup ` A) ≤ Inf (G ` A)"
by (simp add: local.INF_greatest)
also have "Inf (G ` A) ≤ ⨆(Inf ` ?F)"
by (rule SUP_upper) (use E in blast)
finally have "⨅(Sup ` A) ≤ ⨆(Inf ` ?F)"
by simp
with C show ?thesis
using not_less by blast
qed
qed
end
end