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tree eval(
n
,
φ
,
Q
,
d
,
w
)
;
if
d
=
n
then
return(evaluate(
φ
,
w
))
;
else
if
first
(
Q
)=
∃
then
return(tree eval(
n
,
φ
, rest(
Q
),
d
+
1,
w
0
)
OR
tree eval(
n
,
φ
, rest(
Q
),
d
+
1,
w
1
))
;
else
return(tree eval(
n
,
φ
, rest(
Q
),
d
+
1,
w
0
)
AND
tree eval(
n
,
φ
, rest(
Q
),
d
+
1,
w
1
))
;
Figure 8.17
A program for the recursive procedure
tree eval
(
n
,
φ
,
Q
,
d
,
w
). The tuple
w
keeps track of the path taken into the tree.
The circuit
C
qsat
has size exponential in
n
because there are 2
n
values for the
n
variables.
However, it can be evaluated in polynomial space, as we show. For this purpose consider the
recursive procedure
tree eval(
n
,
φ
,
Q
,
d
,
w
)
in Fig.
8.17
that evaluates
C
qsat
.Here
n
is
the number of variables in the quantization,
d
is the depth of recursion,
φ
is the expression
over which quantification is done,
Q
is a sequence of quantifiers, and
w
holds the values for
d
variables. Also,
first(
Q
)
and
rest(
Q
)
are the first and all but the first components of
Q
, respectively. When
d
=
0,
Q
=(
Q
1
,
Q
2
,
...
,
Q
n
)
and
Q
1
x
1
Q
2
x
2
Q
n
x
n
φ
is the
expression to evaluate. We show that
tree eval(
n
,
φ
,
Q
,0,
)
can be computed in space
quadratic in the length of an instance of
QUANTIFIED SATISFIABILITY
.
When
d
=
n
, the procedure has reached a leaf of the tree and the string
w
contains
values for the variables
x
1
,
x
2
,
...
,
x
n
, in that order. Since all variables of
φ
are known when
d
=
n
,
φ
can be evaluated. Let
evaluate
(
φ
,
w
) be the function that evaluates
φ
with values
specified by
w
. Clearly
tree eval(
n
,
φ
,
Q
,0,
)
is the value of
Q
1
x
1
Q
2
x
2
···
···
Q
n
x
n
φ
.
We now determine the work space needed to compute
tree eval(
n
,
φ
,
Q
,
d
,
w
)
on
a DTM. (The discussion in the proof of Theorem
8.5.5
is relevant.) Evaluation of this
procedure amounts to a depth-first traversal of the tree. An activation record is created for
each call to the procedure and is pushed onto a stack. Since the depth of the tree is
n
,atmost
n
+
1 records will be on the stack. Since each activation record contains a string of length at
most
O
(
n
)
, the total space used is
O
(
n
2
)
.Andthelengthof
Q
1
x
1
Q
2
x
2
···
Q
n
x
n
φ
is at
least
n
, the space is polynomial in the length of this formula.
LEMMA
8.12.2
QUANTIFIED SATISFIABILITY
is log-space hard for
PSPACE
.
Proof
Our goal is to show that every decision problem
PSPACE
can be reduced in
log-space to an instance of
QUANTIFIED SATISFIABILITY
. Instead, we show that every such
P
P∈
can be reduced in log-space to a “No” instance of
QUANTIFIED SATISFIABILITY
(we call
this
QUANTIFIED UNSATISFIABILITY
). But a “No” instance is one for which the formula
φ
, which is in product-of-sums form, is not satisfied under the specified quantification or
that its Boolean complement, which is in sum-of-products expansion (SOPE) form, is sat-
isfied under a quantification in which
and vice versa. Exchanging “Yes”
and “No” instances of decision problems (which we can do since
PSPACE
is closed un-
∀
is replaced by
∃
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