(* Author: Peter Lammich
Tobias Nipkow (tuning)
*)
section \<open>Binomial Heap\<close>
theory Binomial_Heap
imports
"HOL-Library.Pattern_Aliases"
Complex_Main
Priority_Queue_Specs
begin
text \<open>
We formalize the binomial heap presentation from Okasaki's book.
We show the functional correctness and complexity of all operations.
The presentation is engineered for simplicity, and most
proofs are straightforward and automatic.
\<close>
subsection \<open>Binomial Tree and Heap Datatype\<close>
datatype 'a tree = Node (rank: nat) (root: 'a) (children: "'a tree list")
type_synonym 'a heap = "'a tree list"
subsubsection \<open>Multiset of elements\<close>
fun mset_tree :: "'a::linorder tree \<Rightarrow> 'a multiset" where
"mset_tree (Node _ a ts) = {#a#} + (\<Sum>t\<in>#mset ts. mset_tree t)"
definition mset_heap :: "'a::linorder heap \<Rightarrow> 'a multiset" where
"mset_heap ts = (\<Sum>t\<in>#mset ts. mset_tree t)"
lemma mset_tree_simp_alt[simp]:
"mset_tree (Node r a ts) = {#a#} + mset_heap ts"
unfolding mset_heap_def by auto
declare mset_tree.simps[simp del]
lemma mset_tree_nonempty[simp]: "mset_tree t \<noteq> {#}"
by (cases t) auto
lemma mset_heap_Nil[simp]:
"mset_heap [] = {#}"
by (auto simp: mset_heap_def)
lemma mset_heap_Cons[simp]: "mset_heap (t#ts) = mset_tree t + mset_heap ts"
by (auto simp: mset_heap_def)
lemma mset_heap_empty_iff[simp]: "mset_heap ts = {#} \<longleftrightarrow> ts=[]"
by (auto simp: mset_heap_def)
lemma root_in_mset[simp]: "root t \<in># mset_tree t"
by (cases t) auto
lemma mset_heap_rev_eq[simp]: "mset_heap (rev ts) = mset_heap ts"
by (auto simp: mset_heap_def)
subsubsection \<open>Invariants\<close>
text \<open>Binomial tree\<close>
fun invar_btree :: "'a::linorder tree \<Rightarrow> bool" where
"invar_btree (Node r x ts) \<longleftrightarrow>
(\<forall>t\<in>set ts. invar_btree t) \<and> map rank ts = rev [0..<r]"
text \<open>Ordering (heap) invariant\<close>
fun invar_otree :: "'a::linorder tree \<Rightarrow> bool" where
"invar_otree (Node _ x ts) \<longleftrightarrow> (\<forall>t\<in>set ts. invar_otree t \<and> x \<le> root t)"
definition "invar_tree t \<longleftrightarrow> invar_btree t \<and> invar_otree t"
text \<open>Binomial Heap invariant\<close>
definition "invar ts \<longleftrightarrow> (\<forall>t\<in>set ts. invar_tree t) \<and> (sorted_wrt (<) (map rank ts))"
text \<open>The children of a node are a valid heap\<close>
lemma invar_children:
"invar_tree (Node r v ts) \<Longrightarrow> invar (rev ts)"
by (auto simp: invar_tree_def invar_def rev_map[symmetric])
subsection \<open>Operations and Their Functional Correctness\<close>
subsubsection \<open>\<open>link\<close>\<close>
context
includes pattern_aliases
begin
fun link :: "('a::linorder) tree \<Rightarrow> 'a tree \<Rightarrow> 'a tree" where
"link (Node r x\<^sub>1 ts\<^sub>1 =: t\<^sub>1) (Node r' x\<^sub>2 ts\<^sub>2 =: t\<^sub>2) =
(if x\<^sub>1\<le>x\<^sub>2 then Node (r+1) x\<^sub>1 (t\<^sub>2#ts\<^sub>1) else Node (r+1) x\<^sub>2 (t\<^sub>1#ts\<^sub>2))"
end
lemma invar_link:
assumes "invar_tree t\<^sub>1"
assumes "invar_tree t\<^sub>2"
assumes "rank t\<^sub>1 = rank t\<^sub>2"
shows "invar_tree (link t\<^sub>1 t\<^sub>2)"
using assms unfolding invar_tree_def
by (cases "(t\<^sub>1, t\<^sub>2)" rule: link.cases) auto
lemma rank_link[simp]: "rank (link t\<^sub>1 t\<^sub>2) = rank t\<^sub>1 + 1"
by (cases "(t\<^sub>1, t\<^sub>2)" rule: link.cases) simp
lemma mset_link[simp]: "mset_tree (link t\<^sub>1 t\<^sub>2) = mset_tree t\<^sub>1 + mset_tree t\<^sub>2"
by (cases "(t\<^sub>1, t\<^sub>2)" rule: link.cases) simp
subsubsection \<open>\<open>ins_tree\<close>\<close>
fun ins_tree :: "'a::linorder tree \<Rightarrow> 'a heap \<Rightarrow> 'a heap" where
"ins_tree t [] = [t]"
| "ins_tree t\<^sub>1 (t\<^sub>2#ts) =
(if rank t\<^sub>1 < rank t\<^sub>2 then t\<^sub>1#t\<^sub>2#ts else ins_tree (link t\<^sub>1 t\<^sub>2) ts)"
lemma invar_tree0[simp]: "invar_tree (Node 0 x [])"
unfolding invar_tree_def by auto
lemma invar_Cons[simp]:
"invar (t#ts)
\<longleftrightarrow> invar_tree t \<and> invar ts \<and> (\<forall>t'\<in>set ts. rank t < rank t')"
by (auto simp: invar_def)
lemma invar_ins_tree:
assumes "invar_tree t"
assumes "invar ts"
assumes "\<forall>t'\<in>set ts. rank t \<le> rank t'"
shows "invar (ins_tree t ts)"
using assms
by (induction t ts rule: ins_tree.induct) (auto simp: invar_link less_eq_Suc_le[symmetric])
lemma mset_heap_ins_tree[simp]:
"mset_heap (ins_tree t ts) = mset_tree t + mset_heap ts"
by (induction t ts rule: ins_tree.induct) auto
lemma ins_tree_rank_bound:
assumes "t' \<in> set (ins_tree t ts)"
assumes "\<forall>t'\<in>set ts. rank t\<^sub>0 < rank t'"
assumes "rank t\<^sub>0 < rank t"
shows "rank t\<^sub>0 < rank t'"
using assms
by (induction t ts rule: ins_tree.induct) (auto split: if_splits)
subsubsection \<open>\<open>insert\<close>\<close>
hide_const (open) insert
definition insert :: "'a::linorder \<Rightarrow> 'a heap \<Rightarrow> 'a heap" where
"insert x ts = ins_tree (Node 0 x []) ts"
lemma invar_insert[simp]: "invar t \<Longrightarrow> invar (insert x t)"
by (auto intro!: invar_ins_tree simp: insert_def)
lemma mset_heap_insert[simp]: "mset_heap (insert x t) = {#x#} + mset_heap t"
by(auto simp: insert_def)
subsubsection \<open>\<open>merge\<close>\<close>
context
includes pattern_aliases
begin
fun merge :: "'a::linorder heap \<Rightarrow> 'a heap \<Rightarrow> 'a heap" where
"merge ts\<^sub>1 [] = ts\<^sub>1"
| "merge [] ts\<^sub>2 = ts\<^sub>2"
| "merge (t\<^sub>1#ts\<^sub>1 =: h\<^sub>1) (t\<^sub>2#ts\<^sub>2 =: h\<^sub>2) = (
if rank t\<^sub>1 < rank t\<^sub>2 then t\<^sub>1 # merge ts\<^sub>1 h\<^sub>2 else
if rank t\<^sub>2 < rank t\<^sub>1 then t\<^sub>2 # merge h\<^sub>1 ts\<^sub>2
else ins_tree (link t\<^sub>1 t\<^sub>2) (merge ts\<^sub>1 ts\<^sub>2)
)"
end
lemma merge_simp2[simp]: "merge [] ts\<^sub>2 = ts\<^sub>2"
by (cases ts\<^sub>2) auto
lemma merge_rank_bound:
assumes "t' \<in> set (merge ts\<^sub>1 ts\<^sub>2)"
assumes "\<forall>t\<^sub>1\<in>set ts\<^sub>1. rank t < rank t\<^sub>1"
assumes "\<forall>t\<^sub>2\<in>set ts\<^sub>2. rank t < rank t\<^sub>2"
shows "rank t < rank t'"
using assms
by (induction ts\<^sub>1 ts\<^sub>2 arbitrary: t' rule: merge.induct)
(auto split: if_splits simp: ins_tree_rank_bound)
lemma invar_merge[simp]:
assumes "invar ts\<^sub>1"
assumes "invar ts\<^sub>2"
shows "invar (merge ts\<^sub>1 ts\<^sub>2)"
using assms
by (induction ts\<^sub>1 ts\<^sub>2 rule: merge.induct)
(auto 0 3 simp: Suc_le_eq intro!: invar_ins_tree invar_link elim!: merge_rank_bound)
text \<open>Longer, more explicit proof of @{thm [source] invar_merge},
to illustrate the application of the @{thm [source] merge_rank_bound} lemma.\<close>
lemma
assumes "invar ts\<^sub>1"
assumes "invar ts\<^sub>2"
shows "invar (merge ts\<^sub>1 ts\<^sub>2)"
using assms
proof (induction ts\<^sub>1 ts\<^sub>2 rule: merge.induct)
case (3 t\<^sub>1 ts\<^sub>1 t\<^sub>2 ts\<^sub>2)
\<comment> \<open>Invariants of the parts can be shown automatically\<close>
from "3.prems" have [simp]:
"invar_tree t\<^sub>1" "invar_tree t\<^sub>2"
(*"invar (merge (t\<^sub>1#ts\<^sub>1) ts\<^sub>2)"
"invar (merge ts\<^sub>1 (t\<^sub>2#ts\<^sub>2))"
"invar (merge ts\<^sub>1 ts\<^sub>2)"*)
by auto
\<comment> \<open>These are the three cases of the @{const merge} function\<close>
consider (LT) "rank t\<^sub>1 < rank t\<^sub>2"
| (GT) "rank t\<^sub>1 > rank t\<^sub>2"
| (EQ) "rank t\<^sub>1 = rank t\<^sub>2"
using antisym_conv3 by blast
then show ?case proof cases
case LT
\<comment> \<open>@{const merge} takes the first tree from the left heap\<close>
then have "merge (t\<^sub>1 # ts\<^sub>1) (t\<^sub>2 # ts\<^sub>2) = t\<^sub>1 # merge ts\<^sub>1 (t\<^sub>2 # ts\<^sub>2)" by simp
also have "invar \<dots>" proof (simp, intro conjI)
\<comment> \<open>Invariant follows from induction hypothesis\<close>
show "invar (merge ts\<^sub>1 (t\<^sub>2 # ts\<^sub>2))"
using LT "3.IH" "3.prems" by simp
\<comment> \<open>It remains to show that \<open>t\<^sub>1\<close> has smallest rank.\<close>
show "\<forall>t'\<in>set (merge ts\<^sub>1 (t\<^sub>2 # ts\<^sub>2)). rank t\<^sub>1 < rank t'"
\<comment> \<open>Which is done by auxiliary lemma @{thm [source] merge_rank_bound}\<close>
using LT "3.prems" by (force elim!: merge_rank_bound)
qed
finally show ?thesis .
next
\<comment> \<open>@{const merge} takes the first tree from the right heap\<close>
case GT
\<comment> \<open>The proof is anaologous to the \<open>LT\<close> case\<close>
then show ?thesis using "3.prems" "3.IH" by (force elim!: merge_rank_bound)
next
case [simp]: EQ
\<comment> \<open>@{const merge} links both first trees, and inserts them into the merged remaining heaps\<close>
have "merge (t\<^sub>1 # ts\<^sub>1) (t\<^sub>2 # ts\<^sub>2) = ins_tree (link t\<^sub>1 t\<^sub>2) (merge ts\<^sub>1 ts\<^sub>2)" by simp
also have "invar \<dots>" proof (intro invar_ins_tree invar_link)
\<comment> \<open>Invariant of merged remaining heaps follows by IH\<close>
show "invar (merge ts\<^sub>1 ts\<^sub>2)"
using EQ "3.prems" "3.IH" by auto
\<comment> \<open>For insertion, we have to show that the rank of the linked tree is \<open>\<le>\<close> the
ranks in the merged remaining heaps\<close>
show "\<forall>t'\<in>set (merge ts\<^sub>1 ts\<^sub>2). rank (link t\<^sub>1 t\<^sub>2) \<le> rank t'"
proof -
\<comment> \<open>Which is, again, done with the help of @{thm [source] merge_rank_bound}\<close>
have "rank (link t\<^sub>1 t\<^sub>2) = Suc (rank t\<^sub>2)" by simp
thus ?thesis using "3.prems" by (auto simp: Suc_le_eq elim!: merge_rank_bound)
qed
qed simp_all
finally show ?thesis .
qed
qed auto
lemma mset_heap_merge[simp]:
"mset_heap (merge ts\<^sub>1 ts\<^sub>2) = mset_heap ts\<^sub>1 + mset_heap ts\<^sub>2"
by (induction ts\<^sub>1 ts\<^sub>2 rule: merge.induct) auto
subsubsection \<open>\<open>get_min\<close>\<close>
fun get_min :: "'a::linorder heap \<Rightarrow> 'a" where
"get_min [t] = root t"
| "get_min (t#ts) = min (root t) (get_min ts)"
lemma invar_tree_root_min:
assumes "invar_tree t"
assumes "x \<in># mset_tree t"
shows "root t \<le> x"
using assms unfolding invar_tree_def
by (induction t arbitrary: x rule: mset_tree.induct) (fastforce simp: mset_heap_def)
lemma get_min_mset:
assumes "ts\<noteq>[]"
assumes "invar ts"
assumes "x \<in># mset_heap ts"
shows "get_min ts \<le> x"
using assms
apply (induction ts arbitrary: x rule: get_min.induct)
apply (auto
simp: invar_tree_root_min min_def intro: order_trans;
meson linear order_trans invar_tree_root_min
)+
done
lemma get_min_member:
"ts\<noteq>[] \<Longrightarrow> get_min ts \<in># mset_heap ts"
by (induction ts rule: get_min.induct) (auto simp: min_def)
lemma get_min:
assumes "mset_heap ts \<noteq> {#}"
assumes "invar ts"
shows "get_min ts = Min_mset (mset_heap ts)"
using assms get_min_member get_min_mset
by (auto simp: eq_Min_iff)
subsubsection \<open>\<open>get_min_rest\<close>\<close>
fun get_min_rest :: "'a::linorder heap \<Rightarrow> 'a tree \<times> 'a heap" where
"get_min_rest [t] = (t,[])"
| "get_min_rest (t#ts) = (let (t',ts') = get_min_rest ts
in if root t \<le> root t' then (t,ts) else (t',t#ts'))"
lemma get_min_rest_get_min_same_root:
assumes "ts\<noteq>[]"
assumes "get_min_rest ts = (t',ts')"
shows "root t' = get_min ts"
using assms
by (induction ts arbitrary: t' ts' rule: get_min.induct) (auto simp: min_def split: prod.splits)
lemma mset_get_min_rest:
assumes "get_min_rest ts = (t',ts')"
assumes "ts\<noteq>[]"
shows "mset ts = {#t'#} + mset ts'"
using assms
by (induction ts arbitrary: t' ts' rule: get_min.induct) (auto split: prod.splits if_splits)
lemma set_get_min_rest:
assumes "get_min_rest ts = (t', ts')"
assumes "ts\<noteq>[]"
shows "set ts = Set.insert t' (set ts')"
using mset_get_min_rest[OF assms, THEN arg_cong[where f=set_mset]]
by auto
lemma invar_get_min_rest:
assumes "get_min_rest ts = (t',ts')"
assumes "ts\<noteq>[]"
assumes "invar ts"
shows "invar_tree t'" and "invar ts'"
proof -
have "invar_tree t' \<and> invar ts'"
using assms
proof (induction ts arbitrary: t' ts' rule: get_min.induct)
case (2 t v va)
then show ?case
apply (clarsimp split: prod.splits if_splits)
apply (drule set_get_min_rest; fastforce)
done
qed auto
thus "invar_tree t'" and "invar ts'" by auto
qed
subsubsection \<open>\<open>del_min\<close>\<close>
definition del_min :: "'a::linorder heap \<Rightarrow> 'a::linorder heap" where
"del_min ts = (case get_min_rest ts of
(Node r x ts\<^sub>1, ts\<^sub>2) \<Rightarrow> merge (rev ts\<^sub>1) ts\<^sub>2)"
lemma invar_del_min[simp]:
assumes "ts \<noteq> []"
assumes "invar ts"
shows "invar (del_min ts)"
using assms
unfolding del_min_def
by (auto
split: prod.split tree.split
intro!: invar_merge invar_children
dest: invar_get_min_rest
)
lemma mset_heap_del_min:
assumes "ts \<noteq> []"
shows "mset_heap ts = mset_heap (del_min ts) + {# get_min ts #}"
using assms
unfolding del_min_def
apply (clarsimp split: tree.split prod.split)
apply (frule (1) get_min_rest_get_min_same_root)
apply (frule (1) mset_get_min_rest)
apply (auto simp: mset_heap_def)
done
subsubsection \<open>Instantiating the Priority Queue Locale\<close>
text \<open>Last step of functional correctness proof: combine all the above lemmas
to show that binomial heaps satisfy the specification of priority queues with merge.\<close>
interpretation binheap: Priority_Queue_Merge
where empty = "[]" and is_empty = "(=) []" and insert = insert
and get_min = get_min and del_min = del_min and merge = merge
and invar = invar and mset = mset_heap
proof (unfold_locales, goal_cases)
case 1 thus ?case by simp
next
case 2 thus ?case by auto
next
case 3 thus ?case by auto
next
case (4 q)
thus ?case using mset_heap_del_min[of q] get_min[OF _ \<open>invar q\<close>]
by (auto simp: union_single_eq_diff)
next
case (5 q) thus ?case using get_min[of q] by auto
next
case 6 thus ?case by (auto simp add: invar_def)
next
case 7 thus ?case by simp
next
case 8 thus ?case by simp
next
case 9 thus ?case by simp
next
case 10 thus ?case by simp
qed
subsection \<open>Complexity\<close>
text \<open>The size of a binomial tree is determined by its rank\<close>
lemma size_mset_btree:
assumes "invar_btree t"
shows "size (mset_tree t) = 2^rank t"
using assms
proof (induction t)
case (Node r v ts)
hence IH: "size (mset_tree t) = 2^rank t" if "t \<in> set ts" for t
using that by auto
from Node have COMPL: "map rank ts = rev [0..<r]" by auto
have "size (mset_heap ts) = (\<Sum>t\<leftarrow>ts. size (mset_tree t))"
by (induction ts) auto
also have "\<dots> = (\<Sum>t\<leftarrow>ts. 2^rank t)" using IH
by (auto cong: map_cong)
also have "\<dots> = (\<Sum>r\<leftarrow>map rank ts. 2^r)"
by (induction ts) auto
also have "\<dots> = (\<Sum>i\<in>{0..<r}. 2^i)"
unfolding COMPL
by (auto simp: rev_map[symmetric] interv_sum_list_conv_sum_set_nat)
also have "\<dots> = 2^r - 1"
by (induction r) auto
finally show ?case
by (simp)
qed
lemma size_mset_tree:
assumes "invar_tree t"
shows "size (mset_tree t) = 2^rank t"
using assms unfolding invar_tree_def
by (simp add: size_mset_btree)
text \<open>The length of a binomial heap is bounded by the number of its elements\<close>
lemma size_mset_heap:
assumes "invar ts"
shows "2^length ts \<le> size (mset_heap ts) + 1"
proof -
from \<open>invar ts\<close> have
ASC: "sorted_wrt (<) (map rank ts)" and
TINV: "\<forall>t\<in>set ts. invar_tree t"
unfolding invar_def by auto
have "(2::nat)^length ts = (\<Sum>i\<in>{0..<length ts}. 2^i) + 1"
by (simp add: sum_power2)
also have "\<dots> \<le> (\<Sum>t\<leftarrow>ts. 2^rank t) + 1"
using sorted_wrt_less_sum_mono_lowerbound[OF _ ASC, of "(^) (2::nat)"]
using power_increasing[where a="2::nat"]
by (auto simp: o_def)
also have "\<dots> = (\<Sum>t\<leftarrow>ts. size (mset_tree t)) + 1" using TINV
by (auto cong: map_cong simp: size_mset_tree)
also have "\<dots> = size (mset_heap ts) + 1"
unfolding mset_heap_def by (induction ts) auto
finally show ?thesis .
qed
subsubsection \<open>Timing Functions\<close>
text \<open>
We define timing functions for each operation, and provide
estimations of their complexity.
\<close>
definition T_link :: "'a::linorder tree \<Rightarrow> 'a tree \<Rightarrow> nat" where
[simp]: "T_link _ _ = 1"
fun T_ins_tree :: "'a::linorder tree \<Rightarrow> 'a heap \<Rightarrow> nat" where
"T_ins_tree t [] = 1"
| "T_ins_tree t\<^sub>1 (t\<^sub>2 # rest) = (
(if rank t\<^sub>1 < rank t\<^sub>2 then 1
else T_link t\<^sub>1 t\<^sub>2 + T_ins_tree (link t\<^sub>1 t\<^sub>2) rest)
)"
definition T_insert :: "'a::linorder \<Rightarrow> 'a heap \<Rightarrow> nat" where
"T_insert x ts = T_ins_tree (Node 0 x []) ts"
lemma T_ins_tree_simple_bound: "T_ins_tree t ts \<le> length ts + 1"
by (induction t ts rule: T_ins_tree.induct) auto
subsubsection \<open>\<open>T_insert\<close>\<close>
lemma T_insert_bound:
assumes "invar ts"
shows "T_insert x ts \<le> log 2 (size (mset_heap ts) + 1) + 1"
proof -
have 1: "T_insert x ts \<le> length ts + 1"
unfolding T_insert_def by (rule T_ins_tree_simple_bound)
also have "\<dots> \<le> log 2 (2 * (size (mset_heap ts) + 1))"
proof -
from size_mset_heap[of ts] assms
have "2 ^ length ts \<le> size (mset_heap ts) + 1"
unfolding invar_def by auto
hence "2 ^ (length ts + 1) \<le> 2 * (size (mset_heap ts) + 1)" by auto
thus ?thesis using le_log2_of_power by blast
qed
finally show ?thesis
by (simp only: log_mult of_nat_mult) auto
qed
subsubsection \<open>\<open>T_merge\<close>\<close>
context
includes pattern_aliases
begin
fun T_merge :: "'a::linorder heap \<Rightarrow> 'a heap \<Rightarrow> nat" where
"T_merge ts\<^sub>1 [] = 1"
| "T_merge [] ts\<^sub>2 = 1"
| "T_merge (t\<^sub>1#ts\<^sub>1 =: h\<^sub>1) (t\<^sub>2#ts\<^sub>2 =: h\<^sub>2) = 1 + (
if rank t\<^sub>1 < rank t\<^sub>2 then T_merge ts\<^sub>1 h\<^sub>2
else if rank t\<^sub>2 < rank t\<^sub>1 then T_merge h\<^sub>1 ts\<^sub>2
else T_ins_tree (link t\<^sub>1 t\<^sub>2) (merge ts\<^sub>1 ts\<^sub>2) + T_merge ts\<^sub>1 ts\<^sub>2
)"
end
text \<open>A crucial idea is to estimate the time in correlation with the
result length, as each carry reduces the length of the result.\<close>
lemma T_ins_tree_length:
"T_ins_tree t ts + length (ins_tree t ts) = 2 + length ts"
by (induction t ts rule: ins_tree.induct) auto
lemma T_merge_length:
"length (merge ts\<^sub>1 ts\<^sub>2) + T_merge ts\<^sub>1 ts\<^sub>2 \<le> 2 * (length ts\<^sub>1 + length ts\<^sub>2) + 1"
by (induction ts\<^sub>1 ts\<^sub>2 rule: T_merge.induct)
(auto simp: T_ins_tree_length algebra_simps)
text \<open>Finally, we get the desired logarithmic bound\<close>
lemma T_merge_bound_aux:
fixes ts\<^sub>1 ts\<^sub>2
defines "n\<^sub>1 \<equiv> size (mset_heap ts\<^sub>1)"
defines "n\<^sub>2 \<equiv> size (mset_heap ts\<^sub>2)"
assumes BINVARS: "invar ts\<^sub>1" "invar ts\<^sub>2"
shows "T_merge ts\<^sub>1 ts\<^sub>2 \<le> 4*log 2 (n\<^sub>1 + n\<^sub>2 + 1) + 2"
proof -
define n where "n = n\<^sub>1 + n\<^sub>2"
from T_merge_length[of ts\<^sub>1 ts\<^sub>2]
have "T_merge ts\<^sub>1 ts\<^sub>2 \<le> 2 * (length ts\<^sub>1 + length ts\<^sub>2) + 1" by auto
hence "(2::nat)^T_merge ts\<^sub>1 ts\<^sub>2 \<le> 2^(2 * (length ts\<^sub>1 + length ts\<^sub>2) + 1)"
by (rule power_increasing) auto
also have "\<dots> = 2*(2^length ts\<^sub>1)\<^sup>2*(2^length ts\<^sub>2)\<^sup>2"
by (auto simp: algebra_simps power_add power_mult)
also note BINVARS(1)[THEN size_mset_heap]
also note BINVARS(2)[THEN size_mset_heap]
finally have "2 ^ T_merge ts\<^sub>1 ts\<^sub>2 \<le> 2 * (n\<^sub>1 + 1)\<^sup>2 * (n\<^sub>2 + 1)\<^sup>2"
by (auto simp: power2_nat_le_eq_le n\<^sub>1_def n\<^sub>2_def)
from le_log2_of_power[OF this] have "T_merge ts\<^sub>1 ts\<^sub>2 \<le> log 2 \<dots>"
by simp
also have "\<dots> = log 2 2 + 2*log 2 (n\<^sub>1 + 1) + 2*log 2 (n\<^sub>2 + 1)"
by (simp add: log_mult log_nat_power)
also have "n\<^sub>2 \<le> n" by (auto simp: n_def)
finally have "T_merge ts\<^sub>1 ts\<^sub>2 \<le> log 2 2 + 2*log 2 (n\<^sub>1 + 1) + 2*log 2 (n + 1)"
by auto
also have "n\<^sub>1 \<le> n" by (auto simp: n_def)
finally have "T_merge ts\<^sub>1 ts\<^sub>2 \<le> log 2 2 + 4*log 2 (n + 1)"
by auto
also have "log 2 2 \<le> 2" by auto
finally have "T_merge ts\<^sub>1 ts\<^sub>2 \<le> 4*log 2 (n + 1) + 2" by auto
thus ?thesis unfolding n_def by (auto simp: algebra_simps)
qed
lemma T_merge_bound:
fixes ts\<^sub>1 ts\<^sub>2
defines "n\<^sub>1 \<equiv> size (mset_heap ts\<^sub>1)"
defines "n\<^sub>2 \<equiv> size (mset_heap ts\<^sub>2)"
assumes "invar ts\<^sub>1" "invar ts\<^sub>2"
shows "T_merge ts\<^sub>1 ts\<^sub>2 \<le> 4*log 2 (n\<^sub>1 + n\<^sub>2 + 1) + 2"
using assms T_merge_bound_aux unfolding invar_def by blast
subsubsection \<open>\<open>T_get_min\<close>\<close>
fun T_get_min :: "'a::linorder heap \<Rightarrow> nat" where
"T_get_min [t] = 1"
| "T_get_min (t#ts) = 1 + T_get_min ts"
lemma T_get_min_estimate: "ts\<noteq>[] \<Longrightarrow> T_get_min ts = length ts"
by (induction ts rule: T_get_min.induct) auto
lemma T_get_min_bound:
assumes "invar ts"
assumes "ts\<noteq>[]"
shows "T_get_min ts \<le> log 2 (size (mset_heap ts) + 1)"
proof -
have 1: "T_get_min ts = length ts" using assms T_get_min_estimate by auto
also have "\<dots> \<le> log 2 (size (mset_heap ts) + 1)"
proof -
from size_mset_heap[of ts] assms have "2 ^ length ts \<le> size (mset_heap ts) + 1"
unfolding invar_def by auto
thus ?thesis using le_log2_of_power by blast
qed
finally show ?thesis by auto
qed
subsubsection \<open>\<open>T_del_min\<close>\<close>
fun T_get_min_rest :: "'a::linorder heap \<Rightarrow> nat" where
"T_get_min_rest [t] = 1"
| "T_get_min_rest (t#ts) = 1 + T_get_min_rest ts"
lemma T_get_min_rest_estimate: "ts\<noteq>[] \<Longrightarrow> T_get_min_rest ts = length ts"
by (induction ts rule: T_get_min_rest.induct) auto
lemma T_get_min_rest_bound_aux:
assumes "invar ts"
assumes "ts\<noteq>[]"
shows "T_get_min_rest ts \<le> log 2 (size (mset_heap ts) + 1)"
proof -
have 1: "T_get_min_rest ts = length ts" using assms T_get_min_rest_estimate by auto
also have "\<dots> \<le> log 2 (size (mset_heap ts) + 1)"
proof -
from size_mset_heap[of ts] assms have "2 ^ length ts \<le> size (mset_heap ts) + 1"
by auto
thus ?thesis using le_log2_of_power by blast
qed
finally show ?thesis by auto
qed
lemma T_get_min_rest_bound:
assumes "invar ts"
assumes "ts\<noteq>[]"
shows "T_get_min_rest ts \<le> log 2 (size (mset_heap ts) + 1)"
using assms T_get_min_rest_bound_aux unfolding invar_def by blast
text\<open>Note that although the definition of function \<^const>\<open>rev\<close> has quadratic complexity,
it can and is implemented (via suitable code lemmas) as a linear time function.
Thus the following definition is justified:\<close>
definition "T_rev xs = length xs + 1"
definition T_del_min :: "'a::linorder heap \<Rightarrow> nat" where
"T_del_min ts = T_get_min_rest ts + (case get_min_rest ts of (Node _ x ts\<^sub>1, ts\<^sub>2)
\<Rightarrow> T_rev ts\<^sub>1 + T_merge (rev ts\<^sub>1) ts\<^sub>2
)"
lemma T_rev_ts1_bound_aux:
fixes ts
defines "n \<equiv> size (mset_heap ts)"
assumes BINVAR: "invar (rev ts)"
shows "T_rev ts \<le> 1 + log 2 (n+1)"
proof -
have "T_rev ts = length ts + 1" by (auto simp: T_rev_def)
hence "2^T_rev ts = 2*2^length ts" by auto
also have "\<dots> \<le> 2*n+2" using size_mset_heap[OF BINVAR] by (auto simp: n_def)
finally have "2 ^ T_rev ts \<le> 2 * n + 2" .
from le_log2_of_power[OF this] have "T_rev ts \<le> log 2 (2 * (n + 1))"
by auto
also have "\<dots> = 1 + log 2 (n+1)"
by (simp only: of_nat_mult log_mult) auto
finally show ?thesis by (auto simp: algebra_simps)
qed
lemma T_del_min_bound_aux:
fixes ts
defines "n \<equiv> size (mset_heap ts)"
assumes BINVAR: "invar ts"
assumes "ts\<noteq>[]"
shows "T_del_min ts \<le> 6 * log 2 (n+1) + 3"
proof -
obtain r x ts\<^sub>1 ts\<^sub>2 where GM: "get_min_rest ts = (Node r x ts\<^sub>1, ts\<^sub>2)"
by (metis surj_pair tree.exhaust_sel)
note BINVAR' = invar_get_min_rest[OF GM \<open>ts\<noteq>[]\<close> BINVAR]
hence BINVAR1: "invar (rev ts\<^sub>1)" by (blast intro: invar_children)
define n\<^sub>1 where "n\<^sub>1 = size (mset_heap ts\<^sub>1)"
define n\<^sub>2 where "n\<^sub>2 = size (mset_heap ts\<^sub>2)"
have T_rev_ts1_bound: "T_rev ts\<^sub>1 \<le> 1 + log 2 (n+1)"
proof -
note T_rev_ts1_bound_aux[OF BINVAR1, simplified, folded n\<^sub>1_def]
also have "n\<^sub>1 \<le> n"
unfolding n\<^sub>1_def n_def
using mset_get_min_rest[OF GM \<open>ts\<noteq>[]\<close>]
by (auto simp: mset_heap_def)
finally show ?thesis by (auto simp: algebra_simps)
qed
have "T_del_min ts = T_get_min_rest ts + T_rev ts\<^sub>1 + T_merge (rev ts\<^sub>1) ts\<^sub>2"
unfolding T_del_min_def by (simp add: GM)
also have "\<dots> \<le> log 2 (n+1) + T_rev ts\<^sub>1 + T_merge (rev ts\<^sub>1) ts\<^sub>2"
using T_get_min_rest_bound_aux[OF assms(2-)] by (auto simp: n_def)
also have "\<dots> \<le> 2*log 2 (n+1) + T_merge (rev ts\<^sub>1) ts\<^sub>2 + 1"
using T_rev_ts1_bound by auto
also have "\<dots> \<le> 2*log 2 (n+1) + 4 * log 2 (n\<^sub>1 + n\<^sub>2 + 1) + 3"
using T_merge_bound_aux[OF \<open>invar (rev ts\<^sub>1)\<close> \<open>invar ts\<^sub>2\<close>]
by (auto simp: n\<^sub>1_def n\<^sub>2_def algebra_simps)
also have "n\<^sub>1 + n\<^sub>2 \<le> n"
unfolding n\<^sub>1_def n\<^sub>2_def n_def
using mset_get_min_rest[OF GM \<open>ts\<noteq>[]\<close>]
by (auto simp: mset_heap_def)
finally have "T_del_min ts \<le> 6 * log 2 (n+1) + 3"
by auto
thus ?thesis by (simp add: algebra_simps)
qed
lemma T_del_min_bound:
fixes ts
defines "n \<equiv> size (mset_heap ts)"
assumes "invar ts"
assumes "ts\<noteq>[]"
shows "T_del_min ts \<le> 6 * log 2 (n+1) + 3"
using assms T_del_min_bound_aux unfolding invar_def by blast
end