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|
MLit
(
Core
(
REDUCE
(
ψ ∧ l
)))
| <n
,
|
MLit
(
Core
(
REDUCE
(
ψ ∧¬l
)))
| <n
.
Since
φ
is unsatisfiable then by Lemma 18,
ψ
is also unsatisfiable. Then for
each
l ∈
Lit
,
ψ ∧ l
and
ψ ∧¬l
are unsatisfiable. By Lemma 18,
REDUCE
(
ψ ∧ l
)
and
REDUCE
(
ψ ∧¬l
) are unsatisfiable. By induction hypothesis, the procedure
returns “unsatisfiable” for
REDUCE
(
ψ ∧ l
)and
REDUCE
(
ψ ∧¬l
). By definition
of
UIF-DPLL
, the procedure returns “unsatisfiable” for
φ
.
(
) Let the procedure returns “unsatisfiable”. We will give a proof by in-
duction on the number of
UIF-DPLL
calls.
Base case
. Let the procedure returns “unsatisfiable” after one call. Then
⊥∈
REDUCE
(
φ
). By Lemma 18, we obtain that
φ
is unsatisfiable.
Inductive step
.Let
φ
⇐
be unsatisfiable if
UIF-DPLL
(
φ
) returns “unsatisfi-
1 calls. Assume that
UIF-DPLL
(
φ
) returns “unsatisfi-
able” after
n
calls. By definition of
UIF-DPLL
,
UIF-DPLL
(
REDUCE
(
φ
)
n −
able” after at most
∧ l
)and
UIF-DPLL
(
REDUCE
(
φ
)
∧¬l
) returns “unsatisfiable” after at most
n −
1 calls.
Then by induction hypothesis,
REDUCE
(
φ
)
∧¬l
are unsat-
isfiable CNFs. We obtain that
REDUCE
(
φ
) is unsatisfiable. By Lemma 18,
φ
is
also unsatisfiable.
∧ l
and
REDUCE
(
φ
)
6
The Extended
UIF-DPLL
Calculus
In this section we will introduce an optimization technique which can be used
as a preprocessing step.
Definition 20.
Let
t ∈
SubTerm
(
φ
)
,
depth
(
t
)
>
1
and for each
s ∈
SubTerm
p
(
t
)
and
u ∈
Term
(
φ
)
,
(
s ≈ u
)
∈
Lit
(
φ
)
.Then
t
is called reducible in
φ
.
Example 21.
Let us consider the formula from Example 11.
¬φ
0
:
u
1
≈ f
(
x
1
,y
1
)
∧u
2
≈ f
(
x
2
,y
2
)
∧z ≈ g
(
u
1
,u
2
)
∧z ≈ g
(
f
(
x
1
,y
1
)
,f
(
x
2
,y
2
))
.
The terms
f
(
x
1
,y
1
)and
f
(
x
2
,y
2
) are reducible.
Definition 22.
Avariable
x
is called fresh in
φ
if
x ∈
Var
(
φ
)
.
6.1
The Term Reduction Rule
One may add one more rule to the
UIF-DPLL
calculus.
φ
φ
[
t
:=
x
]
Term Reduction
:
if
t
is reducible and
x
is fresh in
φ
This rule can be applied as a preprocessing step. We will show it with an
example.
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