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Q
-substitution
ϕ
,
(
ρ ◦ ϕ
)
with no unification pairs) such that for any
Q
∃
is an
U
-solution, and every
U
-solution can be obtained in this way. Since the empty
Q
-substitution,
substitution is a
ρ
Q
∃
is an
U
-solution, which is most general
in the sense stated.
unif
(
Q,
r
=
s
) denotes the result of the unification algorithm at
U
=
Q
r
=
s
.
4ProofS ch
A
Q
-sequent
has the form
P⇒G
,where
P
is a list of
Q
-clauses and
G
is a
Q
-goal.
We write
M
[
P
] to indicate that all assumption variables in the derivation
M
concern clauses in
P
.
M
G
i
i
n
S
Write
for a set
S
of sequents if there are derivations
[
P
i
]inlong
such that
#
<n
normal form for all (
P
i
⇒ G
i
)
∈ S
M
i
≤ n
.Let
S
mean
∃m<n
m
S
.
We now prove correctness and completeness of the proof search procedure:
correctness is the if-part of the two lemmata to follow, and completeness the
only-if-part.
Lemma 3.
Let
Q
be a
∀∃∀
-prefix,
{P ⇒ ∀
x
.
D
→ A}∪SQ
-sequents with
x
,
D
not both empty. Then we have for every substitution
ϕ
:
n
{P ⇒ ∀
x
.
D
→ A}∪S
ϕ
ϕ
is a
Q
-substitution such that
if and only if
<n
{P ∪
D
⇒ A}∪S
ϕ
ϕ
is a
Q∀
x
-substitution such that
.
<n
{P ∪
D
⇒ A}∪S
ϕ
Proof. “If”
.Let
ϕ
be a
Q∀
x
-substitution and
.Sowe
have
N
Aϕ
[
D
ϕ ∪Pϕ
]
.
Since
ϕ
is a
Q∀
x
-substitution, no variable in
x
can be free in
Pϕ
,orfreein
yϕ
for some
y ∈
dom
(
ϕ
). Hence
(
∀
x
.
D
→A
)
ϕ
[
λ
x
λ
u
D
ϕ
N
M
Pϕ
]:=
is a correct derivation.
“Only if”
.Let
n
{P ⇒ ∀
x
.
D
→ A}∪S
ϕ
ϕ
be a
Q
-substitution and
.This
means we have a derivation (in long normal form)
(
∀
x
.
D
→A
)
ϕ
[
λ
x
λ
u
D
ϕ
.N
Aϕ
[
M
Pϕ
]=
D
ϕ ∪Pϕ
]
.
<n
{P ∪
D
⇒ A}∪S
ϕ
Now #
N<
#
M
, hence
,and
ϕ
clearly is a
Q∀
x
-
substitution.
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